Minimizing Concurrent Test Time in SoC’s by Balancing Resource Usage ABSTRACT
state variables 英文 定义
In the realm of computer science and programming, state variables serve as fundamental building blocks for modeling systems and processes that evolve over time. They embody the essence of dynamic behavior in software applications, enabling developers to capture and manipulate various aspects of an object or system's condition at any given moment. This essay delves into the concept of state variables from multiple perspectives, providing a detailed definition, discussing their roles and significance, examining their implementation across various programming paradigms, exploring their impact on program design, and addressing the challenges they introduce.**Definition of State Variables**At its core, a state variable is a named data item within a program or computational system that maintains a value that may change over the course of program execution. It represents a specific aspect of the system's state, which is the overall configuration or condition that determines its behavior and response to external stimuli. The following key characteristics define state variables:1. **Persistence:** State variables retain their values throughout the lifetime of an object or a program's execution, unless explicitly modified. These variables hold onto information that persists beyond a single function call or statement execution.2. **Mutability:** State variables are inherently mutable, meaning their values can be altered by program instructions. This property allows programs to model evolving conditions or track changes in a system over time.3. **Contextual Dependency:** The value of a state variable is dependent on the context in which it is accessed, typically determined by the object or scope to which it belongs. This context sensitivity ensures encapsulation and prevents unintended interference with other parts of the program.4. **Time-variant Nature:** State variables reflect the temporal dynamics of a system, capturing how its properties or attributes change in response to internal operations or external inputs. They allow programs to model systemswith non-static behaviors and enable the simulation of real-world scenarios with varying conditions.**Roles and Significance of State Variables**State variables play several critical roles in software development, contributing to the expressiveness, versatility, and realism of programs:1. **Modeling Dynamic Systems:** State variables are instrumental in simulating real-world systems with changing states, such as financial transactions, game characters, network connections, or user interfaces. By representing the relevant attributes of these systems as state variables, programmers can accurately model complex behaviors and interactions over time.2. **Enabling Data Persistence:** In many applications, maintaining user preferences, application settings, or transaction histories is crucial. State variables facilitate this persistence by storing and updating relevant data as the program runs, ensuring that users' interactions and system events leave a lasting impact.3. **Supporting Object-Oriented Programming:** In object-oriented languages, state variables (often referred to as instance variables) form an integral part of an object's encapsulated data. They provide the internal representation of an object's characteristics, allowing objects to maintain their unique identity and behavior while interacting with other objects or the environment.4. **Facilitating Concurrency and Parallelism:** State variables underpin the synchronization and coordination mechanisms in concurrent and parallel systems. They help manage shared resources, enforce mutual exclusion, and ensure data consistency among concurrently executing threads or processes.**Implementation Across Programming Paradigms**State variables find expression in various programming paradigms, each with its own idiomatic approach to managing and manipulating them:1. **Object-Oriented Programming (OOP):** In OOP languages like Java, C++, or Python, state variables are typically declared as instance variables withina class. They are accessed through methods (getters and setters), ensuring encapsulation and promoting a clear separation of concerns between an object's internal state and its external interface.2. **Functional Programming (FP):** Although FP emphasizes immutability and statelessness, state management is still necessary in practical applications. FP languages like Haskell, Scala, or Clojure often employ monads (e.g., State monad) or algebraic effects to model stateful computations in a pure, referentially transparent manner. These constructs encapsulate state changes within higher-order functions, preserving the purity of the underlying functional model.3. **Imperative Programming:** In imperative languages like C or JavaScript, state variables are directly manipulated through assignment statements. Control structures (e.g., loops and conditionals) often rely on modifying state variables to drive program flow and decision-making.4. **Reactive Programming:** Reactive frameworks like React or Vue.js utilize state variables (e.g., component state) to manage UI updates in response to user interactions or data changes. These frameworks provide mechanisms (e.g., setState() in React) to handle state transitions and trigger efficient UI re-rendering.**Impact on Program Design**The use of state variables significantly influences program design, both positively and negatively:1. **Modularity and Encapsulation:** Well-designed state variables promote modularity by encapsulating relevant information within components, objects, or modules. This encapsulation enhances code organization, simplifies maintenance, and facilitates reuse.2. **Complexity Management:** While state variables enable rich behavioral modeling, excessive or poorly managed state can lead to complexity spirals. Convoluted state dependencies, hidden side effects, and inconsistent state updates can make programs difficult to understand, test, and debug.3. **Testing and Debugging:** State variables introduce a temporal dimension to program behavior, necessitating thorough testing across different states and input scenarios. Techniques like unit testing, property-based testing, and state-machine testing help validate state-related logic. Debugging tools often provide features to inspect and modify state variables at runtime, aiding in diagnosing issues.4. **Concurrency and Scalability:** Properly managing shared state is crucial for concurrent and distributed systems. Techniques like lock-based synchronization, atomic operations, or software transactional memory help ensure data consistency and prevent race conditions. Alternatively, architectures like event-driven or actor-based systems minimize shared state and promote message-passing for improved scalability.**Challenges and Considerations**Despite their utility, state variables pose several challenges that programmers must address:1. **State Explosion:** As programs grow in size and complexity, the number of possible state combinations can increase exponentially, leading to a phenomenon known as state explosion. Techniques like state-space reduction, model checking, or static analysis can help manage this complexity.2. **Temporal Coupling:** State variables can introduce temporal coupling, where the correct behavior of a piece of code depends on the order or timing of state changes elsewhere in the program. Minimizing temporal coupling through decoupled designs, immutable data structures, or functional reactive programming can improve code maintainability and resilience.3. **Caching and Performance Optimization:** Managing state efficiently is crucial for performance-critical applications. Techniques like memoization, lazy evaluation, or cache invalidation strategies can optimize state access and updates without compromising correctness.4. **Debugging and Reproducibility:** Stateful programs can be challenging to debug due to their non-deterministic nature. Logging, deterministic replaysystems, or snapshot-based debugging techniques can help reproduce and diagnose issues related to state management.In conclusion, state variables are an indispensable concept in software engineering, enabling programmers to model dynamic systems, maintain data persistence, and implement complex behaviors. Their proper utilization and management are vital for creating robust, scalable, and maintainable software systems. While they introduce challenges such as state explosion, temporal coupling, and debugging complexities, a deep understanding of state variables and their implications on program design can help developers harness their power effectively, ultimately driving innovation and progress in the field of computer science.。
腾讯NDA限制-腾讯NDA限制-Jacinto6Eco SoC电源解决方案-DRA72 TDA2
TPS22965 + TPS51200
8
New PDN Concept
0.40 = $3.25
(3 AVS @ 1‐2.5A, Dual 1.8/3.3V IO, DDR3L)
18 + 4 + 4.6 + 4.6 + 4 + 9 = 44
$4.42 128 $2.53 74
$7.32 190 $4.64 119
5. “PDN’s AVS Capability” is the achievable power if all AVS power rails are increased to 90% of capacity while other power rails remain at typical Use Case modelled values.
(3 AVS @ 1‐3.5A, Dual 1.8/3.3V IO, DDR3L) (similar to EVM PDN #0)
49 + 9 + 4 = 62
#8.2 – LP87524 + LP5912 + TLV713 + LP5907 +
9.92
1.26 + 0.19 + 0.07 + 0.10 + 0.10 +
2. PDN Support component (Rs, Cs & Ls) pricing from Mouser Distribution website using single 4k – 10k/reel qty costs as of May 2016. Both PDN Support & PDN Total Costs have been provided for relative comparison only, individual customer volume pricing may vary.
Oracle 应用测试套件 - Oracle E-Business Suite 功能测试加速器说明书
ORACLE APPLICATION TESTING SUITE - TESTING ACCELERATORS FOR ORACLE E-BUSINESS SUITEFEATURES• Automates complex Oracle E-Business Suite transactionsfor both functional testing andload testing• Supports automation of bothWeb and Oracle Formsapplication interfaces andprotocols• Provides custom test cases tovalidate application content• Enables parameterization oftest scripts for data-driventesting• Simulates loads of hundredsto tens of thousands ofconcurrent users whileminimizing hardwarerequirements• Gathers critical infrastructureperformance metrics toidentify bottlenecks underload• Provides an intuitive Web-based console to configureand run load tests and sharereal-time results withdistributed users• EBS Test Starter Kit withsample test scripts providedfor EBS R12 and 11iOracle Application Testing Suite’s Testing Accelerators for Oracle E-Business Suite provide a comprehensive solution for ensuring the quality and performance of Oracle E-Business Suite applications. The Functional Testing Accelerator for Oracle E-Business Suite extends Oracle Functional Testing to enable automated functional and regression testing of Oracle E-Business Suite applications. The Load Testing Accelerator for Oracle E-Business Suite extends Oracle Load Testing to enable load and performance testing of Oracle E-Business Suite applications. The Testing Accelerators for Oracle E-Business Suite are components of Oracle Application Testing Suite, the centerpiece of the Oracle Enterprise Manager solution for comprehensive testing of packaged, Web and service-oriented architecture–based applications. Ensuring Oracle E-Business Suite Application Quality Ensuring the quality of your Oracle E-Business Suite (EBS) applications is critical to your business. But testing EBS applications prior to deployment and keeping up with the pace application updates while maintaining application quality can be a challenge. Oracle Application Testing Suite (ATS) provides a comprehensive quality management solution for Oracle E-Business Suite. Oracle Functional Testing and the Functional Testing Accelerator for Oracle E-Business Suite provides an automated functional and regression testing solution to validate application functionality prior to deployment and reduce the need for manual testing. Oracle Load Testing and the Load Testing Accelerator for Oracle E-Business Suite provide a powerful load testing solution to test and tune application performance under real production workloads and identify bottlenecks. Oracle Test Manager provides an integrated solution for managing the test process including documenting test cases, test requirements and issues identified during testing in a central repository and managing test execution. Together, these products provide a comprehensive solution for ensuring EBS application quality. Functional Testing Accelerator for Oracle E-Business Suite The Functional Testing Accelerator for Oracle E-Business Suite extends Oracle Functional Testing to provide a powerful and easy-to-use solution to automate functional and regression testing of Oracle’s E-Business Suite applications. OracleFunctional Testing allows users to create test scripts that automate complex business transactions within their EBS applications, including both Web and Oracle Forms based application interfaces. Oracle Functional Testing’s OpenScript integrated scripting platform combines an intuitive graphical scripting interface to quickly create complex test scripts and a powerful Java IDE that provides users with the flexibility to extend scripts programmatically. Users can automate business transactions by simply creating a new script and recording as they step through an EBS transaction in a browser. OpenScript captures all actions performed within Web or Forms based applications interfaces which can then be played back to automatically reproduce the recorded transaction. Users can then add test cases to validate specific Web or Forms application content and parameterize their script inputs to perform data-driven testing. Additional transactions can then be recorded to create a comprehensive automated regression test suite.Figure1. Oracle Functional Testing automates Oracle E-Business Suite functional and regression testingLoad Testing Accelerator for Oracle E-Business SuiteThe Load Testing Accelerator for Oracle E-Business Suite extends Oracle Load Testing to enable automated load and performance testing of Oracle E-Business Suite applications. With Oracle Load Testing you can simulate thousands of virtual users accessing the Oracle E-Business Suite application simultaneously to measure the effect of user load on application performance.Users create their EBS load test scripts in Oracle Functional Testing’s OpenScript integrated scripting platform. OpenScript automates both Web and Forms application protocols to generate highly scalable load test scripts for Oracle EBS. The scripts are automatically correlated to handle dynamic session parameters. These scripts can then be configured to run in Oracle Load Testing against any number of virtual users.Oracle Load Testing provides a Web-based console that allows you to configure and run one or multiple scripts across thousands of virtual users to assess performance. Users can specify a number of run time parameters such as the amount of think time each user spends per page and the browser or connection speed to emulate. During the load test, Oracle Load Testing measures end-user response times as well as the performance of the underlying application infrastructure to help identify and resolve application performance bottlenecks.Comprehensive Testing for Oracle E-Business SuiteOracle Application Testing Suite provides a comprehensive testing solution for Oracle E-Business Suite. With Oracle Functional Testing and the Functional Testing Accelerator for Oracle E-Business Suite, users can effectively introduce automation into their functional test process to ensure the quality of their Oracle E-Business Suite applications and reduce testing time. With Oracle Load Testing and the Load Testing Accelerator for Oracle E-Business Suite, users can leverage a powerful solution for ensuring Oracle E-Business Suite application performance. The Oracle E-Business Suite testing accelerator includes a Test Starter Kit with pre-build test automation scripts for Oracle E-Business Suite applications. The Test Starter Kit covers a broad range of applications and user flows for both functional and performance testing based on the VISION demo database.And with Oracle Test Manager users can effectively document and manage their test process from a central location and report on application readiness.Oracle Application Testing Suite provides a powerful integrated scripting platform for automated functional & regression testing and load testing. Oracle Functional Testing’s OpenScript integrated scripting interface provides a unique combination of ease-of-use and flexibility through its intuitive graphical scripting interface and powerful Java IDE for extending scripts at the code-level. Oracle Functional Testing also provides custom capabilities for testing SOA and Oracle packaged applications through its integrated testing accelerators. Oracle Load Testing provides a fully Web-based user interface for configuring and running load tests and an integrated ServerStats module for monitoring application infrastructure during a load test to identify bottlenecks. Oracle Load Testing also enables multi-user collaboration by allowing testers to view and share real-time results during load test execution through their browser. With Oracle Application Testing Suite users can leverage a comprehensive, integrated solution for automated functional and regression testing, load testing and test process management.Contact UsFor more information about Oracle Application Testing Suite Oracle E-Business Suite Accelerators and Oracle Enterprise Manager please visit or call+1.800.ORACLE1 to speak to an Oracle representative.Copyright © 2011, Oracle and/or its affiliates. All rights reserved.This document is provided for information purposes only and the contents hereof are subject to change without notice. This document is not warranted to be error-free, nor subject to any other warranties or conditions, whether expressed orally or implied in law, including implied warranties and conditions of merchantability or fitness for a particular purpose. We specifically disclaim any liability with respect to this document and no contractual obligations are formed either directly or indirectly by this document. This document may not be reproduced or transmitted in any form or by any means, electronic or mechanical, for any purpose, without our prior written permission.Oracle and Java are registered trademarks of Oracle and/or its affiliates. Other names may be trademarks of their respective owners.AMD, Opteron, the AMD logo, and the AMD Opteron logo are trademarks or registered trademarks of Advanced Micro Devices. Intel and Intel Xeon are trademarks or registered trademarks of Intel Corporation. All SPARC trademarks are used under license and are trademarks or registered trademarks of SPARC International, Inc. UNIX is a registered trademark licensed through X/Open Company, Ltd. 0110。
swirlymms
swirlymmsSwirlyMMS: A High-Performance Solution for Multimedia Messaging ServiceIntroductionMultimedia Messaging Service (MMS) has become an integral part of our daily communication, allowing us to send multimedia content such as images, videos, and audio files directly to other users' mobile phones. With the increasing demand for richer and more engaging media content, MMS platforms are faced with the challenge of delivering these files quickly and efficiently. This document introduces SwirlyMMS, a high-performance solution designed to enhance and optimize the delivery of multimedia content via MMS.1. Overview of MMSMMS refers to the technology that enables users to exchange multimedia files over a mobile network. Compared to traditional Short Message Service (SMS) which only supports text, MMS allows the transmission of various media types,including images, videos, audio, and even slideshows. This enhanced messaging capability has revolutionized the way we communicate and share information on mobile devices.2. The Need for High-Performance MMS SolutionsAs the popularity of multimedia content continues to grow, there is a need for MMS platforms to handle higher volumes of data and deliver them with minimal delay. Users expect their multimedia messages to be delivered promptly and reliably, regardless of the size or complexity of the media files.3. Introducing SwirlyMMSSwirlyMMS is a cutting-edge solution designed to meet the demands of high-performance multimedia messaging. Leveraging advanced technologies and optimization techniques, SwirlyMMS aims to provide a seamless and efficient user experience for both senders and receivers of multimedia messages.4. Key Features4.1. Enhanced Performance: SwirlyMMS utilizes optimized transmission protocols and algorithms to ensure swift and reliable delivery of multimedia content. By minimizing the transfer time, users can enjoy a seamless experience when sending and receiving media files.4.2. Scalability: SwirlyMMS is built to handle high volumes of data and concurrent connections, making it suitable for large-scale deployments. The solution can easily adapt to the ever-increasing demand for multimedia messaging services.4.3. Media Compression: To optimize bandwidth usage and reduce transfer times, SwirlyMMS employs advanced compression techniques. This allows for the efficient transmission of multimedia files without compromising the quality of the content.4.4. Cross-Platform Compatibility: SwirlyMMS is designed to work seamlessly across different mobile operating systems and devices. Whether it's Android, iOS, or Windows, SwirlyMMS ensures a consistent and reliable experience for all users.4.5. Secure and Reliable: SwirlyMMS prioritizes the security and privacy of multimedia messages. The solutionincorporates robust encryption algorithms and authentication mechanisms to protect the confidentiality and integrity of the transmitted content.5. Benefits of SwirlyMMS5.1. Improved User Experience: SwirlyMMS enhances the speed and reliability of multimedia messaging, ensuring a seamless user experience. Users can easily send and receive multimedia content without interruptions or delays.5.2. Cost-Efficiency: SwirlyMMS optimizes bandwidth usage by compressing media files, resulting in reduced data consumption and lower costs for both users and service providers.5.3. Increased Productivity: With SwirlyMMS, businesses can efficiently exchange important documents, images, and videos, improving productivity and collaboration among team members.5.4. Integration Capability: SwirlyMMS offers APIs and SDKs that allow developers to integrate the solution into existingapplications and platforms, enabling seamless integration and expanding its functionalities.6. ConclusionSwirlyMMS is a high-performance solution that revolutionizes the way we send and receive multimedia messages. By providing enhanced speed, reliability, and security, SwirlyMMS ensures a seamless user experience and opens up new possibilities for businesses and individuals alike. With its advanced features and compatibility across platforms, SwirlyMMS is the ideal solution for optimizing multimedia messaging service.。
Eliminating stack overflow by abstract interpretation
In Proceedings of the3rd International Conference on Embedded Software,Philadelphia,PA,pages306–322,October13–15,2003.c Springer-Verlag. Eliminating stack overflow by abstract interpretationJohn Regehr Alastair Reid Kirk WebbSchool of Computing,University of UtahAbstract.An important correctness criterion for software running on embeddedmicrocontrollers is stack safety:a guarantee that the call stack does not over-flow.We address two aspects of the problem of creating stack-safe embeddedsoftware that also makes efficient use of memory:statically bounding worst-casestack depth,and automatically reducing stack memory requirements.Ourfirstcontribution is a method for statically guaranteeing stack safety by performingwhole-program analysis,using an approach based on context-sensitive abstractinterpretation of machine code.Abstract interpretation permits our analysis toaccurately model when interrupts are enabled and disabled,which is essentialfor accurately bounding the stack depth of typical embedded systems.We haveimplemented a stack analysis tool that targets Atmel A VR microcontrollers,andtested it on embedded applications compiled from up to30,000lines of C.Weexperimentally validate the accuracy of the tool,which runs in a few secondson the largest programs that we tested.The second contribution of this paper isa novel framework for automatically reducing stack memory requirements.Weshow that goal-directed global function inlining can be used to reduce the stackmemory requirements of component-based embedded software,on average,to40%of the requirement of a system compiled without inlining,and to68%of therequirement of a system compiled with aggressive whole-program inlining that isnot directed towards reducing stack usage.1IntroductionInexpensive microcontrollers are used in a wide variety of embedded applications such as vehicle control,consumer electronics,medical automation,and sensor networks. Static analysis of the behavior of software running on these processors is important for two main reasons:–Embedded systems are often used in safety critical applications and can be hard to upgrade once deployed.Since undetected bugs can be very costly,it is useful to attempt tofind software defects early.–Severe constraints on cost,size,and power make it undesirable to overprovision resources as a hedge against unforeseen demand.Rather,worst-case resource re-quirements should be determined statically and accurately,even for resources like memory that are convenient to allocate in a dynamic style.0 KB4 KB Without stack boundingWith static stack bounding Fig.1.Typical RAM layout for an embedded program with and without stack bounding.Without a bound,developers must rely on guesswork to determine the amount of storage to allocate to the stack.In this paper we describe the results of an experiment in applying static analysis techniques to binary programs in order to bound and reduce their stack memory re-quirements.We check embedded programs for stack safety :the property that they will not run out of stack memory at run time.Stack safety,which is not guaranteed by tra-ditional type-safe languages like Java,is particularly important for embedded software because stack overflows can easily crash a system.The transparent dynamic stack ex-pansion that is performed by general-purpose operating systems is infeasible on small embedded systems due to lack of virtual memory hardware and limited availability of physical memory.For example,8-bit microcontrollers typically have between a few tens of bytes and a few tens of kilobytes of RAM.Bounds on stack depth can also be usefully incorporated into executable programs,for example to assign appropriate stack sizes to threads or to provide a heap allocator with as much storage as possible without compromising stack safety.The alternative to static stack depth analysis that is currently used in industry is to ensure that memory allocated to the stack exceeds the largest stack size ever observed during testing by some safety margin.A large safety margin would provide good in-surance against stack overflow,but for embedded processors used in products such as sensor network nodes and consumer electronics,the degree of overprovisioning must be kept small in order to minimize per-unit product cost.Figure 1illustrates the rela-tionship between the testing-and analysis-based approaches to allocating memory for the stack.Testing-based approaches to software validation are inherently unreliable,and test-ing embedded software for maximum stack depth is particularly unreliable because its behavior is timing dependent:the worst observed stack depth depends on what code is executing when an interrupt is triggered and on whether further interrupts trigger before the first returns.For example,consider a hypothetical embedded system where the maximum stack depth occurs when the following events occur at almost the same time:1)the main program summarizes data once a second spending 100microseconds2at maximum stack depth;2)a timer interruptfires100times a second spending100mi-croseconds at maximum stack depth;and3)a packet arrives on a network interface up to10times a second;the handler spends100microseconds at maximum stack depth.If these events occur independently of each other,then the worst case will occur roughly once every10years.This means that the worst case will probably not be discovered during testing,but will probably occur in the real world where there may be many in-stances of the embedded system.In practice,the events are not all independent and the timing of some events can be controlled by the test environment.However,we would expect a real system to spend less time at the worst-case stack depth and to involve more events.Another drawback of the testing-based approach to determining stack depth is that it treats the system as a black box,providing developers with little or no feedback about how to best optimize memory usage.Static stack analysis,on the other hand,identifies the critical path through the system and also the maximum stack consumption of each function;this usually exposes obvious candidates for optimization.Using our method for statically bounding stack depth as a starting point,we have developed a novel way to automatically reduce the stack memory requirement of an em-bedded system.The optimization proceeds by evaluating the effect of a large number of potential program transformations in a feedback loop,applying only transformations that reduce the worst-case depth of the stack.Static analysis makes this kind of opti-mization feasible by rapidly providing accurate information about a program.Testing-based approaches to learning about system behavior,on the other hand,are slower and typically only explore a fraction of the possible state space.Our work is preceded by a stack depth analysis by Brylow et al.[3]that also per-forms whole-program analysis of executable programs for embedded systems.How-ever,while they focused on relatively small programs written by hand in assembly lan-guage,we focus on programs that are up to30times larger,and that are compiled from C to a RISC architecture.The added difficulties in analyzing larger,compiled programs necessitated a more powerful approach based on context-sensitive abstract interpreta-tion of machine code;we motivate and describe this approach in Section2.Section3 discusses the problems in experimentally validating the abstract interpretation and stack depth analysis,and presents evidence that the analysis provides accurate results.In Sec-tion4we describe the use of a stack bounding tool to support automatically reducing the stack memory consumption of an embedded system.Finally,we compare our research to previous efforts in Section5and conclude in Section6.2Bounding Stack DepthEmbedded system designers typically try to statically allocate resources needed by the system.This makes systems more predictable and reliable by providing a priori bounds on resource consumption.However,an almost universal exception to this rule is that memory is dynamically allocated on the call stack.Stacks provide a useful model of storage,with constant-time allocation and deallocation and without fragmentation.Fur-thermore,the notion of a stack is designed into microcontrollers at a fundamental level. For example,hardware support for interrupts typically pushes the machine state onto3the stack before calling a user-defined interrupt handler,and pops the machine state upon termination of the handler.For developers of embedded systems,it is important not only to know that the stack depth is bounded,but also to have a tight bound—one that is not much greater than the true worst-case stack depth.This section describes the whole-program analysis that we use to obtain tight bounds on stack depth.Our prototype stack analysis tool targets programs for the Atmel A VR,a popular family of microcontrollers.We chose to analyze binary program images,rather than source code,for a number of reasons:–There is no need to predict compiler behavior.Many compiler decisions,such as those regarding function inlining and register allocation,have a strong effect on stack depth.–Inlined assembly language is common in embedded systems,and a safe analysis must account for its effects.–The source code for libraries and real-time operating systems are commonly not available for analysis.–Since the analysis is independent of the compiler,developers are free to change compilers or compiler versions.In addition,the analysis is not fragile with respect to non-standard language extensions that embedded compilers commonly use to provide developers withfine-grained control over processor-specific features.–Adding a post-compilation analysis step to the development process presents de-velopers with a clean usage model.2.1Analysis Overview and MotivationThefirst challenge in bounding stack depth is to measure the contributions to the stack of each interrupt handler and of the main program.Since indirect function calls and recursion are uncommon in embedded systems[4],a callgraph for each entry point into the program can be constructed using standard analysis techniques.Given a callgraph it is usually straightforward to compute its stack requirement.The second,more difficult,challenge in embedded systems is accurately estimating interactions between interrupt handlers and the main program to compute a maximum stack depth for the whole system.If interrupts are disabled while running interrupt handlers,one can safely estimate the stack bound of a system containing interrupt handlers using this formula:stack bound depth(main)depth(interrupt)However,interrupt handlers are often run with interrupts enabled to ensure that other interrupt handlers are able to meet real-time deadlines.If a system permits at most one concurrent instance of each interrupt handler,the worst-case stack depth of a system can be computed using this formula:stack bound depth(main)depth(interrupt)4Fig.2.This fragment of assembly language for Atmel A VR microcontrollers motivates our approach to program analysis and illustrates a common idiom in embedded soft-ware:disable interrupts,execute a critical section,and then reenable interrupts only if they had previously been enabledUnfortunately,as we show in Section3,this simple formula often provides unneces-sarily pessimistic answers when used to analyze real systems where only some parts of some interrupt handlers run with interrupts enabled.To obtain a safe,tight stack bound for realistic embedded systems,we developed a two-part analysis.Thefirst must generate an accurate estimate of the state of the proces-sor’s interrupt mask at each point in the program,and also the effect of each instruction on the stack depth.The second part of the analysis—unlike thefirst—accounts for potential preemptions between interrupts handlers and can accurately bound the global stack requirement for a system.Figure2presents a fragment of machine code that motivates our approach to pro-gram analysis.Analogous code can be found in almost any embedded system:its pur-pose is to disable interrupts,execute a critical section that must run atomically with respect to interrupt handlers,and then reenable interrupts only if they had previously been enabled.There are a number of challenges in analyzing such code.First,effects of arithmetic and logical operations must be modeled with enough ac-curacy to track data movement through general-purpose and special-purpose registers. In addition,partially unknown data must be modeled.For example,analysis of the code fragment must succeed even when only a single bit of the CPU status register—the master interrupt control bit—is initially known.Second,dead edges in the control-flow graph must be detected and avoided.For ex-ample,when the example code fragment is called in a context where interrupts are dis-abled,it is important that the analysis conclude that the sei instruction is not executed since this would pollute the estimate of the processor state at subsequent addresses.Finally,to prevent procedural aliasing from degrading the estimate of the machine state,a context sensitive analysis must be used.For example,in some systems the code501 (a)Lattice for each bit in the machine stateand1000101111xor110101(b)Logical operations on abstract bits and combining machine states at merge pointsFig.3.Modeling machine states and operations in the abstract interpretationin Figure2is called with interrupts disabled by some parts of the system and is called with interrupts enabled by other parts of the system.With a context-insensitive ap-proach,the analysis concludes that since the initial state of the interruptflag can vary,thefinal state of the interruptflag can also vary and so analysis of both callers of the function would proceed with the interruptflag unknown.This can lead to large over-estimates in stack bounds since unknown values are propagated to any code that could execute after the call.With a context-sensitive analysis the two calls are analyzed sepa-rately,resulting in an accurate estimate of the interrupt state.The next section describes the abstract interpretation we have developed to meet these challenges.2.2Abstracting the Processor StateThe purpose of our abstract interpretation is to generate a safe,precise estimate of the state of the processor at each point in the program;this is a requirement forfindinga tight bound on stack depth.Designing the abstract interpretation boils down to twomain design decisions.First,how much of the machine state should the analysis model?For programs thatwe have analyzed,it is sufficient to model the program counter,general-purpose regis-ters,and several I/O registers.Atmel A VR chips contain32general-purpose registers and64I/O registers;each register stores eight bits.From the I/O space we model theregisters that contain interrupt masks and the processor status register.We do not model main memory or most I/O registers,such as those that implement timers,analog-to-digital conversion,and serial communication.Second,what is the abstract model for each element of machine state?We chose to model the machine at the bit level to capture the effect of bitwise operations on theinterrupt mask and condition code register—we had initially attempted to model themachine at word granularity and this turned out to lose too much information through conservative approximation.Each bit of machine state is modeled using the lattice de-picted in Figure3(a).The lattice contains the values0and1as well as a bottom element, ,that corresponds to a bit that cannot be proven to have value0or1at a particular program point.Figure3(b)shows abstractions of some common logical operators.Abstractions of operators should always return a result that is as accurate as possible.For example,6when all bits of the input to an instruction have the value0or1,the execution of the instruction should have the same result that it would have on a real processor.In this respect our abstract interpreter implements most of the functionality of a standard CPU simulator.For example,when executing the and instruction with as one argument and as the other argument,the result register will con-tain the value.Arithmetic operators are treated similarly,but re-quire more care because bits in the result typically depend on multiple bits in the input. Furthermore,the abstract interpretation must take into account the effect of instructions on processor condition codes,since subsequent branching decisions are made using these values.The example in Figure2illustrates two special cases that must be accounted for in the abstract interpretation.First,the add-with-carry instruction adc,when both of its arguments are the same register,acts as rotate-left-through-carry.In other words,it shifts each bit in its input one position to the left,with the leftmost bit going into the CPU’s carryflag and the previous carryflag going into the rightmost bit.Second,the exclusive-or instruction eor,when both of its arguments are the same register,acts like a clear instruction—after its execution the register is known to contain all zero bits regardless of its previous contents.2.3Managing Abstract Processor StatesAn important decision in designing the analysis was when to create a copy of the ab-stract machine state at a particular program point,as opposed to merging two abstract states.The merge operator,shown in Figure3(b),is lossy since a conservative approx-imation must always be made.We have chosen to implement a context-sensitive anal-ysis,which means that we fork the machine state each time a function call is made, and at no other points in the program.This has several consequences.First,and most important,it means that the abstract interpretation is not forced to make a conservative approximation when a function is called from different points in the program where the processor is in different states.In particular,when a function is called both with inter-rupts enabled and disabled,the analysis is not forced to conclude that the status of the interrupt bit is unknown inside the function and upon return from it.Second,it means that we cannot show termination of a loop implemented within a function.This is not a problem at present since loops are irrelevant to the stack depth analysis as long as there is no net change in stack depth across the loop.However,it will become a problem if we decide to push our analysis forward to bound heap allocation or execution time.Third, it means that we can,in principle,detect termination of recursion.However,our current implementation rarely does so in practice because most recursion is bounded by values that are stored on the stack—which our analysis does not model.Finally,forking the state at function calls means that the state space of the stack analyzer might become large.This has not been a problem in practice;the largest programs that we have ana-lyzed cause the analyzer to allocate about140MB.If memory requirements become a problem for the analysis,a relatively simple solution would be to merge program states that are identical or that are similar enough that a conservative merging will result in minimal loss of precision.72.4Abstract Interpretation and Stack Analysis AlgorithmsThe program analysis begins by initializing a worklist with all entry points into the program;entry points are found by examining the vector of interrupt handlers that is stored at the bottom of a program image,which includes the address of a startup routine that eventually jumps to main().For each item in the worklist,the analyzer abstractly interprets a single instruction.If the interpretation changes the state of the processor at that program point,items are added to the worklist corresponding to each live control flow edge leaving the instruction.Termination is assured because the state space for a program isfinite and because we never revisit states more than once.The abstract interpretation detects control-flow edges that are dead in a particular context,and also control-flow edges that are dead in all contexts.In many systems we have analyzed,the abstract interpretationfinds up to a dozen branches that are provably not taken.This illustrates the increased precision of our analysis relative to the dataflow analysis that an optimizing compiler has previously performed on the embedded pro-gram as part of a dead code elimination pass.In the second phase,the analysis considers there to be a controlflow edge from every instruction in the program to thefirst instruction of every interrupt handler that cannot be proven to be disabled at that program point.An interrupt is disabled if either the master interrupt bit is zero or the enable bit for the particular interrupt is zero.Once these edges are known,the worst-case stack depth for a program can be found using the method developed by Brylow et al.[3]:perform a depth-first search over controlflow edges,explicit and implicit,keeping track of the effect of each instruction on the stack depth,and also keeping track of the largest stack depth seen so far.A complication that we have encountered in many real programs is that interrupt handlers commonly run with all interrupts enabled,admitting the possibility that a new instance of an interrupt handler will be signaled before the previous instance terminates. From an analysis viewpoint reentrant interrupt handlers are a serious problem:systems containing them cannot be proven to be stack-safe without also reasoning about time. In effect,the stack bounding problem becomes predicated on the results of a real-time analysis that is well beyond the current capabilities of our tool.In real systems that we have looked at reentrant interrupt handlers are so common that we have provided a facility for working around the problem by permitting a de-veloper to manually assert that a particular interrupt handler can preempt itself only up to a certain number of times.Programmers appear to commonly rely on ad hoc real-time reasoning,e.g.,“this interrupt only arrives10times per second and so it cannot possibly interrupt itself.”In practice,most instances of this kind of reasoning should be considered to be designflaws—few interrupt handlers are written in a reentrant fashion so it is usually better to design systems where concurrent instances of a single handler are not permitted.Furthermore,stack depth requirements and the potential for race conditions will be kept to a minimum if there are no cycles in the interrupt preemp-tion graph,and if preemption of interrupt handlers is only permitted when necessary to meet a real-time deadline.82.5Other ChallengesIn this section we address other challenges faced by the stack analysis tool:loads into the stack pointer,self-modifying code,indirect branches,indirect stores,and recursive function calls.These features can complicate or defeat static analysis.However,em-bedded developers tend to make very limited use of them,and in our experience static analysis of real programs is still possible and,moreover,effective.We support code that increments or decrements the stack pointer by constants,for example to allocate or deallocate function-scoped data structures.Code that adds non-constants to the stack pointer(e.g.,to allocate variable sized arrays on the stack)would require some extra work to bound the amount of space added to the stack.We also do not support code that changes the stack pointer to new values in a more general way,as is done in the context switch routine of a preemptive operating system.The A VR has a Harvard architecture,making it possible to prove the absence of self-modifying code simply by ensuring that a program cannot reach a“store program memory”instruction.However,by reduction to the halting problem,self-modifying code cannot be reliably detected in the general case.Fortunately,use of self-modifying code is rare and discouraged—it is notoriously difficult to understand and also pre-cludes reducing the cost of an embedded system by putting the program into ROM.Our analysis must build a conservative approximation of the program’s controlflow graph.Indirect branches cause problems for program analysis because it can be diffi-cult to tightly bound the set of potential branch targets.Our approach to dealing with indirect branches is based on the observation that they are usually used in a structured way,and the structure can be exploited to learn the set of targets.For example,when analyzing TinyOS[6]programs,the argument to the function TOSit contained only14recursive loops.Our approach to dealing with recursion,therefore, is blunt:we require that developers explicitly specify a maximum iteration count for each recursive loop in a system.The analysis returns an unbounded stack depth if the developers neglect to specify a limit for a particular loop.It would be straightforward to port our stack analyzer to other processors:the anal-ysis algorithms,such as the whole-program analysis for worst-case stack depth,operate on an abstract representation of the program that is not processor dependent.However, the analysis would return pessimistic results for register-poor architectures such as the Motorola68HC11,since code for those processors makes significant use of the stack, and stack values are not currently modeled by our tool.In particular,we would proba-bly not obtain precise results for code equivalent to the code in Figure2that we used to motivate our approach.To handle register-poor architectures we are developing an approach to modeling the stack that is based on a simple type system for registers that are used as pointers into stack frames.2.6Using the Stack ToolWe have a prototype tool that implements our stack depth analysis.In its simplest mode of usage,the stack tool returns a single number:an upper bound on the stack depth for a system.For example:$./stacktool-w flybywire.elftotal stack requirement from global analysis=55To make the tool more useful we provide a number of extra features,including switching between context-sensitive and context-insensitive program analysis,creating a graphical callgraph for a system,listing branches that can be proven to be dead in all contexts,finding the shortest path through a program that reaches the maximum stack depth,and printing a disassembled version of the embedded program with annotations indicating interrupt status and worst-case stack depth at each instruction.These are all useful in helping developers understand and manually reduce stack memory consump-tion in their programs.There are other obvious ways to use the stack tool that we have not yet implemented. For example,using stack bounds to compute the maximum size of the heap for a sys-tem so that it stops just short of compromising stack safety,or computing a minimum safe stack size for individual threads in a multi-threaded embedded system.Ideally,the analysis would become part of the build process and values from the analysis would be used directly in the code being generated.3Validating the AnalysisWe used several approaches to increase our confidence in the validity of our analysis techniques and their implementations.103.1Validating the Abstract InterpretationTo test the abstract interpretation,we modified a simulator for A VR processors to dump the state of the machine after executing each instruction.Then,we created a separate program to ensure that this concrete state was“within”the conservative approximation of the machine state produced by abstract interpretation at that address,and that the simulator did not execute any instructions that had been marked as dead code by the static analysis.During early development of the analysis this was helpful infinding bugs and in providing a much more thorough check on the abstract interpretation than manual inspection of analysis results—our next-best validation technique.We have tested the current version of the stack analysis tool by executing at least100,000instructions of about a dozen programs,including several that were written specifically to stress-test the analysis,and did notfind any discrepancies.3.2Validating Stack BoundsThere are two important metrics for validating the bounds returned by the stack tool. Thefirst is qualitative:Does the tool ever return an unsafe result?Testing the stack tool against actual execution of about a dozen embedded applications has not turned up any examples where it has returned a bound that is less than an observed stack depth.This justifies some confidence that our algorithms are sound.Our second metric is quantitative:Is the tool capable of returning results that are close to the true worst-case stack depth for a system?The maximum observed stack depth,the worst-case stack depth estimate from the stack tool,and the(non-computable) true worst-case stack depth are related in this way:worst observed true worst estimated worstOne might hope that the precision of the analysis could be validated straightfor-wardly by instrumenting some embedded systems to make them report their worst ob-served stack depth and comparing these values to the bounds on stack depth.For several reasons,this approach produces maximum observed stack depths that are significantly smaller than the estimated worst case and,we believe,the true worst case.First,the timing issues that we discussed in Section1come into play,making it very hard to ob-serve interrupt handlers preempting each other even when it is clearly possible that they may do so.Second,even within the main function and individual interrupt handlers,it can be very difficult to force an embedded system to execute the code path that pro-duces the worst-case stack depth.Embedded systems often present a narrower external interface than do traditional applications,and it is correspondingly harder to force them to execute certain code paths using test inputs.While the difficulty of thorough test-ing is frustrating,it does support our thesis that static program analysis is particularly important in this domain.The71embedded applications that we used to test our analysis come from three families.Thefirst is Autopilot,a simple cyclic-executive style control program for an autonomous helicopter[10].The second is a collection of application programs that are distributed with TinyOS version0.6.1,a small operating system for networked sensor11。
Thermo Scientific MK.4 ESD和Latch-Up测试系统中文名说明书
The Thermo Scientific MK.4 ESD and Latch-Up Test System is a complete,robust and feature-filled turn-key instrumentation test package, which performs automatic and manual HBM, MM, and Latch-Up tests on devices with pin counts up to 2304. It features the highest speed of test execution, lowest zap interval, and extensive parallelism that enables concurrent zapping with interleaved trace test capability to global and company driven quality standards.• Rapid-relay-based operations—up to 2304 channels• Solid state matrix topology for rapid, easy-to-use testing operations • Latch-Up stimulus and device biasing • High voltage power source chassis with patented HV isolation enables excellent pulse source performance • Advanced device preconditioning with six separate vector drive levels • Massive parallelism drives remarkable test and throughput speeds• Addresses global testing demands for devices that are smaller, faster and smarterThermo ScientificMK.4 ESD and Latch-up Test SystemIndustry standard, ESD and Latch-Up test system for producers ofmultifunction high pin-count devices Thirty years in the making! IC structure designers and QA program managers in manufacturing and test house facilities worldwide have embraced the Thermo Scientific™ MK.4, a versatile, powerful, and flexible, high yield test system. Easily upgradeable, the MK.4 ESD and Latch-Up Test System is fully capable of taking your test operations through ever-evolving regulatory and quality standards.Solid-State Matrix TopologyThe advanced rapid relay-based (modular matrix) hardware of the MK.4 system is at least ten times faster than mechanically driven ESD testers. The switching matrix, while providing consistent ESD paths, also allows any pin to be grounded, floated,vectored or connected to any of the installedV/I supplies. Furthermore, advancedalgorithms ensure accurate switching of HV, in support of pulse source technology, per recent JEDEC/ESDA trailing pulse standards.Advanced Controller and CommunicationsA powerful, extraordinarily fast embedded VME controller drives the highest Speed- of-Test execution available. Data transfer between the embedded controller and the tester’s PC server, is handled through TCP/IP communication protocols, minimizing data transfer time. The tester’s PC server can be accessed through internal networks, as well as through the internet allowing remote access to the system to determine the systems status or to gather result information.Product SpecificationsLatch-Up Stimulus and Device Biasing The MK.4 can be equipped with up to eight 100 V four-quadrant Voltage and Current (V/I) power supplies. Each V/I supply has a wide dynamic range enabling it to force and measure very low voltage at high current levels from 100 mV/10 A to 100 V/1 A. The system’s power supply matrix can deliver up to a total of 18A of current, which is distributed between the installed supplies. These supplies are able to provide a fast and versatile means of making DC parametric and leakage measurements as well as providing latch-up pulses, while offering total control and protection of the DUT.Advanced Device PreconditioningThe MK.4 system provides the most advanced device preconditioning capability available. The DUT can be vectored with complex vector patterns, providing excellent control over the device. Each pin can be driven using one of the 6 different vector supplies. The patterns can be up to 256k deep, running at clock speeds of up to 10 MHz. Device conditioning is easily verified, using the read back compare capability available on every pin.Thermo Scientific MK.4 Scimitar™Software Makes Programming Easy, while Providing Unsurpassed Programming FlexibilityThe MK.4 Windows®-based Scimitar operating software empowers users with the flexibility to easily set-up tests based on industry standards or company driven requirements.Device test plans can be created by importing existing text based device files, on the testers PC server or off-line from a satellite PC containing the application. The software also provides the capabilities to import test plans and device files from previous Thermo Scientific test systems.Test vectors from your functional testers can also be imported into the application. And of course, the vector application allows manual creation and debug of vector files.Device test plans and results are stored in an XML data base, providing unsurpassed results handling, sorting and data mining capabilities.Parallelism Drives Remarkable Test Throughput SpeedsThe MK.4 software enables ESD testing of up to twelve devices at one time using the multisite pulse source design.Embedded VME power supplies eliminate any communication delays that would be seen by using stand alone supplies. The embedded parametric (curve tracing) supply also provides fast, accurate curve tracing data to help you analyze your devices performance.The systems curve tracer can also be used as a failure analysis tool by allowing the comparison of stored, known good results, versus results from a new test sample or samples.Ready for Today’s Component Reliability Demands and Anticipating Those to Come ESD and Latch-Up testing of electronic and electrical goods can be very expensive aspects of the design and manufacturing process. This is especially true as market demands for products that are smaller, faster and smarter become the standard rather than the exception. The Thermo Scientific MK.4 leverages the technology and know- how gained over three decades of test system experience, as well as our in-depth participation and contributions to global regulatory bodies governing these changes, enabling today’s products to meet both global and industry-driven quality standards.The real key to our customers’ success is in anticipating what’s next. And to ensure that our customers possess the ability to evolve quickly to meet all change factors with efficiency and cost effectiveness.As such, the strategically-designed, field upgradeable architecture of the MK.4 system ensures a substantial return on investment over a very considerable test system lifecycle, as well as better short- and long-term qualityand ESD and Latch-Up test economies.Custom fixtures include universal package adaptors to enable the industry’s lowest cost-in-service high pin count device fixturing yetdevised. (2304-pin, Universal 1-mm pitch BGA package adaptor shown.)100W V/I Performance Thermo Scientific MK.4: eight-V/I configuration. Powerful V/Is can deliver a total of 800 W to the DUT, enabling complex testing of all advanced high power processors on your product roadmap.Solid state matrix topology for rapid, easy-to-use testing operations. Design ensures waveform integrity and reproducibility.General SpecificationsHuman Body Model (HBM) per ESDA/JEDEC JS-001-2014, MIL-STD 883E, and AEC Q100-002 25 V to 8 kV in steps of 1 V Test to multiple industry standards in one integrated system; no changing or alignment of pulse sources.Wizard-like prompts on multi-step user actions MachineModel (MM) per ESDA STM5.2, JEDEC/JESD22-A115, andAEC Q100-003, 25 V to 1.5 kV in steps of 1 VIntegrated pulse sources allow fast multi-site test execution.Latch-up testing per JEDEC/JESD 78 test pin and AECQ100-004Includes preconditioning, state read-back and full control of each.Rapid Relay-based operations at least 10 times faster thanrobotic-driven testersSuper fast test speeds.Test devices up to 2304 pins Systems available configured as 1152, 1728 or 2304 pins.Waveform network: Two, 12 site HBM (100 pF/1500Ω)and MM (200 pF/0Ω) pulse sources address up to 12devices simultaneouslyPatented design ensures waveform compliance for generations to come.Multiple device selection When multiple devices are present; graphical display indicates the devices selectedfor test; progress indicator displays the current device under test (DUT), along withtest status information.Unsurpassed software architecture Flexible programming, easy to use automated test setups, TCP/IP communication. Enables use of device set-up information Increased efficiency and accuracy from other test equipment, as well as deviceinformation import.Event trigger output Manages setup analysis with customized scope trigger capabilities.High voltage power supply chassis Modular chassis with patented HV isolation enables excellent pulse sourceperformance.Power supply sequencing Provides additional flexibility to meet more demanding test needs of integratedsystem-on-chip (SOC) flexibility.Manages ancillary test equipment through Plug-n feature allows the user to control external devices, such as scopes or heatstreams or other devices the Scimitar Plug-ins feature as required for automatedtesting.Pin drivers for use during Latch-Up testing Vector input/export capability from standard tester platforms and parametricmeasurements.256k vectors per pin with read-back Full real-time bandwidth behind each of the matrix pins.Six independent vector voltage levels Test complex I/O and Multi-Core products with ease.Up to 10MHz vector rate (programmable) Quickly and accurately set the device into the desired state for testing from an internalclock.Comprehensive engineering vector debug. Debug difficult part vectoring setups with flexibility.Up to eight separate V/I supplies (1 stimulus and 7 bias supplies) capability through the V/I matrix High accuracy DUT power, curve tracing, and Latch-up stimulus available; design also provides high current.Low resolution/high accuracy parametric measurements, using an embedded Keithley PSU With the optional Keithley PSU feature (replaces one V/I, nA measurements are achievable, allowing supply bus resistance measurement analysis to be performed.Multiple self-test diagnostic routines Ensures system integrity throughout the entire relay matrix, right up to the test socket Test reports: pre-stress, pre-fail (ESD) and post-fail data,as well as full curve trace and specific data pointmeasurementsData can be exported for statistical evaluation & presentation.Individual pin parametrics Allows the user to define V/I levels, compliance ranges, and curve trace parametersfor each pin individually.Enhanced data set features Report all data gathered for off-line reduction and analysis; core test data is readilyavailable; all data is stored in an easy-to-manipulate standard XML file structure. Interlocked safety cover Ensures no user access during test. All potentially lethal voltages are automaticallyterminated when cover is opened. Safety cover window can be easily modified toaccept 3rd party thermal heads.Dimensions60 cm (23.5 in) W x 99 cm (39 in) D x 127 cm (50 in) H© 2016 Thermo Fisher Scientific Inc. All rights reserved. Windows is a registered trademark of Microsoft Corporation in the United States and/or other countries. All other trademarks are the property of Thermo Fisher Scientific and its subsidiaries. Results may vary under different operating conditions. Specifications, terms and pricing are subject to change. Not all products are available in all countries. Please consult your local sales representative for details.Africa-Other +27 11 570 1840 Australia +61 2 8844 9500 Austria +43 1 333 50 34 0 Belgium +32 53 73 42 41 Canada +1 800 530 8447 China +86 10 8419 3588 Denmark +45 70 23 62 60 Europe-Other +43 1 333 50 34 0Finland /Norway/Sweden+46 8 556 468 00France +33 1 60 92 48 00Germany +49 6103 408 1014India +91 22 6742 9434Italy +39 02 950 591Japan +81 45 453 9100Latin America +1 608 276 5659Middle East +43 1 333 50 34 0Netherlands +31 76 579 55 55South Africa +27 11 570 1840Spain +34 914 845 965Switzerland +41 61 716 77 00UK +44 1442 233555USA +1 800 532 4752Thermo Fisher Scientific,San Jose, CA USA is ISO Certified. CTS.05102016Product SpecificationsScimitar Software FeaturesSummary Panel with easy navigation among device componentsWizard-like prompts on multi-step user actionsControl of external devices through the use of Scimitar’s user programmable Plug-in capabilities, in addition to the Event Trigger Outputs, which provide TTL control signals for external devices, such as power supplies or for triggering oscilloscopesFlexible parametric tests that are defined and placed at an arbitrary position within the executable test plan.Comprehensive results viewer that provides:• ESD and Static Latch-up data viewing capabilities• Curves viewer with zooming capabilities and the ability to add user comments• Data filtering on the following criteria – failed pins, failed results, final stress levels• A complete set or subset of results using user defined parameters• Sorting in ascending or descending order by various column criteriaTree-like logical view of the tests and test plans.Flexible data storage that provides the ability for the end-user to query the dataSeamless support of existing ZapMaster, MK.2, MK.4, and Paragon test plansCurve tracing with curve-to-curve and relative spot-to-spot comparisonOff-line curve analyzing, including third-party generated waveformsCanned JESD78A test (static latch-up only) that can be defined automaticallyPause/Resume test capabilitiesIntermediate results viewingAutomated waveform capture capability and analysis using the embedded EvaluWave software feature。
ENCOUNTERTRUE-TIMEATPG
Encounter True-Time ATPGPart of the Encounter Test family, Encounter True-Time ATPG offers robust automated test patterngeneration (ATPG) engines, proven to generate the highest quality tests for all standard design-for-test (DFT) methods, styles, and flows. It supports not only industry-standard stuck-at and transition fault models, but also raises the bar on fault detection by providing defect-based, user-definable modeling capability with its patented pattern fault technology.Pattern fault technology is what enables the Encounter “gate-exhaustive” coverage(GEC) methodology, proven to be two-to-four times more efficient at detecting gate intrinsic faults than any other static methodologies available on the market (e.g. SSF, N-Detect).For delay test, True-Time ATPGincludes a dynamic timing engine and uses either circuit timing information or constraints to automaticallygenerate transition-based fault tests and faster-than-at-speed tests for identifying very deep sub-micron design-process feature defects (e.g. certain small delay defects).Figure 1: Encounter True-Time ATPG provides a timing-based ATPG engine driven by SDF or SDC informationOn-product clock generation (OPCG) produces and applies patterns to effectively capture this class of faults while minimizing false failures. Use of SDF or SDC information ensures the creation of a highly accurate timing-based pattern set.True-Time ATPG optimizes test coverage through a combination of topological random resistant fault analysis (RRFA) and deterministic fault analysis (DFA)with automated test point insertion—far superior to traditional test coverage algorithms. RRFA is used for early optimi-zation of test coverage, pattern density, and runtime performance. DFA is applied downstream for more detailed circuit-level fault analysis when the highest quality goals must be met.To reduce scan test time while maintaining the highest test coverage, True-Time technology provides intelligent ATPG with on-chip compression (XOR- or MISR-based). It is also power-aware and uses patented technologies to significantly reduce and manage power consumption during manufacturing test.True-Time ATPG also offers a customizable environment to suityour project development needs.The GUI provides highly interactive capabilities for coverage analysis and debug; it includes a powerful sequence analyzer that boosts productivity. Encounter True-Time ATPG is available in two offerings: Basic and Advanced.Benefits• Ensures high quality of shipped silicon with production-proven 2-4x reduction in test escapes• Provides superior partial scan coverage with proprietary pattern fault modeling and sequential ATPG algorithms• Optimizes test coverage with RRFA and DFA test point insertion methodology • Boosts productivity by integrating with Encounter RTL Compiler• Delivers superior runtime throughput with high-performance model build and fault simulation engines as well as distributed ATPG • Lowers cost of test with patterncompaction and compressiontechniques that maintain fullscan coverage• Balances tester costs with diagnosticsmethodologies by offering flexiblecompression architectures with fullX masking capabilities (includingOPMISR+ and XOR-based solutions)• Supports low pin-count testingvia JTAG control of MBIST andhigh-compression ratio technology• Supports reduced pin-count testing forI/O test• Interfaces with Encounter Power Systemfor accurate power calculation andpattern IR drop analysis• Reduces circuit and switching activityduring manufacturing test to managepower consumption• Reduces false failures due tovoltage drop• Provides a GUI with powerfulinteractive analysis capabilitiesincluding a schematic viewer andsequence analyzerEncounter TestPart of the Encounter digital design andimplementation platform, the EncounterTest product family delivers an advancedsilicon verification and yield learningsystem. Encounter Test comprises threeproduct technologies:• Encounter DFT Architect: ensuresease of use, productivity, and predict-ability in generating ATPG-readynetlists containing DFT structures, fromthe most basic to the most complex;available as an add-on option toEncounter RTL Compiler• Encounter True-Time ATPG: ensuresthe fewest test escapes and the highestquality shipped silicon at the lowestdevelopment and production costs• Encounter Diagnostics: delivers themost accurate volume and precisiondiagnostics capabilities to accelerateyield ramp and optimize device andfault modelingEncounter Test also offers a flexible APIusing the PERL language to retrieve designdata from its pervasive database. Thisunique capability allows you to customizeSoC Test Infrastructure• Maximize productivity• Maximize predictabilityTest Pattern Generation• Maximize product quality• Minimize test costsDiagnostic• Maximize yeld and ramp• Maximize silicon bring-upEncounter DFT Architect• Full-chip test infrastructure• Scan compression(XOR and MISR), BIST,IEEE1500, 1149.1/6• ATPG-aware insertionverification• Power-aware DFT and ATPGEncounter True-Time ATPG• Stuck-at, at-speed, andfaster-than-at-speed testing• Design timing drivestest timing• High-quality ATPGEncounter Diagnostics• Volume mode finds criticalyield limiters• Precision mode locatesroot cause• Unsurpassed silicon bring-upprecisionSiliconFigure 2: Encounter Test offers a complete RTL-to-silicon verification flow and methodologies that enable the highest quality IC devices at the lowest costreporting, trace connections in the design, and obtain information that might be helpful for debugging design issues or diagnostics.FeaturesTrue-Time ATPG BasicTrue-Time ATPG Basic contains thestuck-at ATPG engine, which supports:• High correlation test coverage, easeof use, and productivity through integration with the Encounter RTL Compiler synthesis environment• Full scan, partial scan, and sequential ATPG for edge-triggered andLSSD designs• Stuck-at, IDDQ, and I/O parametric fault models• Core-based testing, test data migration, and test reuse• Special support for custom designs such as data pipelines, scan control pipelines, and safe-scan• Test pattern volume optimization using RRFA-based test point insertion• Test coverage optimization usingDFA-based test point insertion• Pre-defined (default) and user-defined defect-based fault modeling andgate-exhaustive coverage based on pattern fault technology• Powerful GUI with interactive analysis capabilitiesPattern fault capability enables defect-based testing with a patented technology for accurately modeling the behavior of nanometer defects, such as bridges and opens for ATPG and diagnostics, and for specifying the complete test of a circuit. The ATPG engine, in turn, uses this definition wherever the circuit is instan-tiated within a design. By default, pattern faults are used to increase coverage of XOR, LATCH, FLOP, TSD, and MUX primi-tives. They can also be used to model unique library cells and transition and delay-type defects.True-Time ATPG AdvancedTrue-Time ATPG Advanced offers thesame capabilities as the Basic configu-ration, plus delay test ATPG functionality.It uses post-layout timing data from theSDF file to calculate the path delay of allpaths in the design, including distributiontrees of test clocks and controls. Usingthis information, you can decide on thebest cycle time(s) to test for in a givenclock domain.True-Time ATPG Advanced is capableof generating tests at multiple testfrequencies to detect potential early yieldfailures and certain small delay defects.You can specify your own cycle time orlet True-Time ATPG calculate one basedon path lengths. It avoids generating testsalong paths that exceed tester cycle timeand/or mask transitions along paths thatexceed tester cycle time. True-Time ATPGgenerates small delay defect patternsbased on longest path analysis to ensurepattern efficiency.A unique feature of the Advancedoffering is its ability to generate faster-than-at-speed tests to detect small delaydefects that would otherwise fail duringsystem test or result in early field failures.True-Time ATPG Advanced also usestester-specific constraint informationduring test pattern generation. Thecombination of actual post-layout timingand tester constraint information withTrue-Time ATPG Advanced algorithmsensures that the test patterns will work“first pass” on the tester.The test coverage optimizationmethodology is expanded beyond RRFAand DFA-based test point insertion(TPI) technology. The combinationof both topological and circuit-levelfault analysis with automated TPIprovides the most advanced capabilityfor ensuring the highest possible testcoverage while controlling the numberof inserted test points. DFA-based TPIBridge TestingFigure 3: Pattern faults model any type ofbridge behavior; net pair lists automaticallycreate bridging fault models; ATPG anddiagnostics use the models to detect andisolate bridgesFigure 4: Power-aware ATPG for scan and capture modes prevents voltage-drop–induced failures in test modeCadence is transforming the global electronics industry through a vision called EDA360.With an application-driven approach to design, our software, hardware, IP, and services helpcustomers realize silicon, SoCs, and complete systems efficiently and profitably. © 2012 Cadence Design Systems, Inc. All rights reserved. Cadence, the Cadence logo, Conformal, Encounter, and VoltageStorm are registered trademarks of Cadence Design Systems, Inc. All other s are properties of their respective holders.has links to Encounter Conformal ® Equivalence Checker to ensure the most efficient, logically equivalent netlist modifications with maximum controllability and observability.The ATPG engine works with multiple compression architectures to generate tests that cut costs by reducing scan test time and data volume. Actual compression ratios are driven by the compression architecture as well asdesign characteristics (e.g. available pins, block-level structures). Users can achieve compression ratios exceeding 100x.Flexible compression options allow you to select a multiple input signature register (MISR) architecture with the highest compression ratio, or an exclusive-or (XOR)–based architecture that enables a highly efficientcombinational compression ratio and a one-pass diagnostics methodology. Both architectures support a broadcast type or XOR-based decompressor.On-product MISR plus (OPMISR+) uses a MISR-based output compression, which eliminates the need to check the response at each cycle. XOR-based compression uses an XOR-tree–based output compression to enable a one-pass flow through diagnostics.Additionally, intelligent ATPG algorithms minimize full-scan correlation issues and reduce power consumption, deliv-ering demonstrated results of >99.5 stuck-at test coverage with >100x test time reduction. Optional X-state masking capability is available on a per-chain/ per-cycle basis. Masking is usuallyrequired when using delay test because delay ATPG may generate unknown states in the circuit.Using the Common Power Format (CPF), True-Time ATPG Advanced automatically generates test modes to enable individual power domains to be tested independently or in small groups. This, along with automaticrecognition and testing of power-specific structures (level shifters, isolation logic, state retention registers) ensures the highest quality for low-power devices.Power-aware ATPG uses industry-leading techniques to manage and significantly reduce power consumption due to scan and capture cycles during manufacturing test. The benefit is reduced risk of false failures due to voltage drop and fewer reliability issues due to excessive power consumption. True-Time ATPG Advanced uses algorithms that limit switching during scan testing to further reduce power consumption.Encounter Test offers a flexible API using the PERL language to retrievedesign data from its pervasive database. This unique capability allows users to customize reporting, trace connections in the design, and obtain information that might be helpful for debugging design issues or diagnostics.Platforms• Sun Solaris (64-bit)• HP-UX (64-bit)• Linux (32-bit, 64-bit)• IBM AIX (64-bit)Cadence Services and Support• Cadence application engineers can answer your technical questions by telephone, email, or Internet—they can also provide technical assistance and custom training • Cadence certified instructors teach more than 70 courses and bring their real-world experience into the classroom • More than 25 Internet Learning Series (iLS) online courses allow you the flexibility of training at your own computer via the Internet • Cadence Online Support gives you24x7 online access to a knowledgebase of the latest solutions, technicaldocumentation, software downloads, and more。
单机下最小化最大延迟问题的滚动调度方法研究
学校代码:10255学号:2130854单机下最小化最大延迟问题的滚动调度方法研究ROLLING HORIZON ALGORITHMS FOR THESINGLE MACHINE MAXIMAL DELAY TIME SCHEDULING PROBLEM WITH RELEASE DATES学科专业:物流工程作者姓名:王鸽指导教师:王长军答辩日期:2015.5.14单机下最小化最大延迟问题的滚动调度方法研究摘要生产调度问题从上世纪七十年代起就被广泛关注,至今依然是研究难点,归根结底为其NP难的属性。
虽然目前遗传、禁忌等邻域算法,基于工件数目、基于时间长度等滚动算法已有大量研究,但是从现实和学术研究角度来说此类问题依然有研究的价值。
本文从单机调度入手,研究在动态到达的环境下,如何获得最小的最大延迟时间的调度。
该问题是NP难问题,同时也是研究现实调度情景的基础问题。
在工件动态到达和现有滚动调度尚有不足的基础上,提出了一种基于冲突窗口(Collision-Window Based,CWB)的滚动调度方法,这种调度策略,使用了一种新的分解问题的方法,使得子问题不再是NP难问题、调度性能不再受工件到达紧密程度影响。
本文给出了CWB滚动调度的具体算法步骤,并且利用C语言编程将其和两种EDD算法、两种传统滚动算法进行大规模仿真比较,证明了在不同工件到达密度和不同工件数目下,新算法求解结果更加稳定、更加优秀。
同时由于子问题的多项式解也使得新算法的求解速度相对于两种传统的滚动算法来说更加快速。
关键词:单机调度、滚动调度、动态到达、到达密度、冲突窗口ROLLING HORIZON ALGORITHMS FOR THE SINGLE MACHINE MAXIMAL DELAY TIME SCHEDULING PROBLEM WITH RELEASE DATESABSTRACTProduction scheduling problem is widely concerned since the 1970s, and until now still is the research challenge. In the final analysis is for its NP-hard attributes. Although genetic, taboos and other neighborhood algorithm, Job-based, Time-based and other rolling algorithm has a number of studies, this problems still have research value from the angle of realistic and academic research.This paper is from the perspective of the single machine scheduling problem. And discuss how to get the minimum of maximal delay time scheduling in a dynamic environment. The problem is a NP hard and it is the basis for the scheduling problem. On the basis of the job dynamic arrival and shortage of the existing rolling scheduling, this paper proposes a Collision-Window Based rolling scheduling method. This scheduling strategy uses a new decomposition problem method to make the sub-problem to be a un NP-hard problem, and the scheduling performance is no longer affected by the job release density.This paper proposes the specific algorithm steps of CWB rolling scheduling algorithm. It is to prove that the new algorithm result is more stable and more outstanding under different job release density and different job number, comparing the new algorithm with EDD, 2 kinds of traditional rolling algorithms and other algorithms using C language programming and large-scale simulation. At the same time the computation speed of the new algorithm is faster compared with the two traditional rolling algorithms due to the polynomial solution of the sub-problem.KEY WORDS:single machine, rolling scheduling, dynamic, release density, collision-window目录摘要 (I)ABSTRACT................................................... I I 本文涉及到的参数符号定义 (V)1绪论 (1)1.1研究背景 (1)1.2研究目的及意义 (2)1.3论文组织结构 (4)2生产调度建模与方法概述 (6)2.1生产调度模型介绍 (6)2.2非滚动式的生产调度方法 (7)2.2.1单机调度 (7)2.2.2并行机与Job shop调度方法 (9)2.3滚动调度调度方法 (10)2.3.1单机滚动调度方法 (11)2.3.2并行机、Job Shop滚动调度方法 (12)2.4滚动调度方法在其他领域的应用 (13)3单机下最大延迟时间问题的EDD及滚动调度算法概述 (15)3.1单机下最大延迟时间动态达到问题的EDD算法概述 (15)3.1.1 EDD算法及其示例 (15)3.1.2 EDD算法特点 (17)3.2单机下最大延迟时间动态达到问题的滚动调度算法概述 (17)3.2.1两种常见的滚动调度算法 (17)3.2.3两种滚动调度算法子问题的常用求解算法 (18)3.2.4两种常见的滚动调度算法示例 (23)4单机下最大延迟时间问题基于冲突窗口的滚动调度算法 (28)4.1冲突窗口定义 (28)4.2子问题的多项式求解 (29)4.2.1基本假设 (29)4.2.2子问题的多项式求解理论推导 (30)4.2.3子问题的多项式求解算法 (32)4.3单机下最大延迟时间问题下基于冲突窗口的滚动调度算法流程 . 33 5仿真比较与分析 (36)5.1随机数据产生 (36)5.1.1 工件到达密度含义 (36)5.1.2 随机数产生规则 (36)5.2单机下最大延迟时间问题的四种不同算法仿真问题结果及分析 . 385.2.2不同工件数下的仿真结果对比分析 (38)5.2.3 不同到达密度下的仿真结果对比分析 (41)5.3考虑带淡旺季的仿真比较与分析 (43)6CWB滚动调度算法与现有制造管理系统整合研究 (46)6.1 制造企业现行MRPⅡ运作基本流程 (46)6.2CWB滚动调度算法与现行MRPⅡ的不一致点 (47)6.3CWB滚动调度算法与MRPⅡ的整合方案 (48)7结论及展望 (50)参考文献 (51)附录 (56)本文涉及到的参数符号定义符号表示意义n 总的工件个数m 未调度的工件个数I 所有工件的集合S未调度工件的集合J i第i个工件(1≤i≤n)r i第i个工件的到达时间。
封装测试
Ø Modeled fault testing
Ø Will detect 100% of detectable modeled faults Ø Requires only 47 vectors Ø Vectors can be generated and analyzed by ATPG tools Ø Note: some of the faults are not able to be detected by
Ø Stuck-short: a single transistor is permanently stuck in short state
Ø Detection of a stuck-open fault requires two vectors
Ø A collapsed fault set contains one fault from each equivalence subset
Ø The length of ATPG patterns is reduced significantly after considering the fault collapse
Microelectronics
上海交通大学微电子学院
Transistor (Switch)Faults
Ø MOS transistor is considered an ideal switch and two types of faults are modeled:
Ø Stuck-open: a single transistor is permanently stuck in open state
FortiGate FortiWiFi 40F系列安全SD-WAN一体化威胁管理防火墙IPS NGF
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USB Port2. Console Port3. 1x GE RJ45 WAN PortFortiGate/FortiWiFi 40F Series4. 1x GE RJ45 FortiLink Port5. 3x GE RJ45 Ethernet PortsPowered by Purpose-built Secure SD-WAN ASIC SOC4§Combines a RISC-based CPU with Fortinet’s proprietary Security Processing Unit (SPU) content and network processors for unmatched performance§Delivers industry’s fastest application identification and steering for efficient business operations§Accelerates IPsec VPN performance for best user experience on direct internet access§Enables the best of breed NGFW Security and Deep SSL Inspection with high performance§Extends security to access layer to enable SD-Branch transformation with accelerated and integrated switch and access point connectivity3G/4G WAN ConnectivityThe FortiGate 40F Series includes a USB port that allows you to plug in a compatible third-party 3G/4G USB modem, providing additional WAN connectivity or a redundant link for maximum reliability.Compact and Reliable Form FactorDesigned for small environments, you can place it on a desktop or wall-mount it. It is small, lightweight yet highly reliable with a superior MTBF (Mean Time Between Failure), minimizing the chance of a network disruption.Exte nds Se curity to Acce ss Laye r with FortiLink PortsFortiLink protocol enables you to converge security and the network access by integrating the FortiSwitch into the FortiGate as a logical extension of the NGFW. These FortiLink enabled ports can be reconfigured as regular ports as needed.allows security to dynamically expand and adapt as more and moreworkloads and data are added. Security seamlessly follows andprotects data, users, and applications as they move between IoT,devices, and cloud environments throughout the network. All thisis tied together under a single pane of glass management therebydelivering leading security capabilities across your entire environmentwhile also significantly reducing complexity.FortiGates are the foundation of Security Fabric, expanding securityvia visibility and control by tightly integrating with other Fortinetsecurity products and Fabric-Ready Partner solutions.FortiOSControl all security and networking capabilities across the entireFortiGate platform with one intuitive operating system. R educecomplexity, costs, and response time with a truly consolidated next-generation security platform.§ A truly consolidated platform with a single OS and pane-of-glass for all security and networking services across all FortiGateplatforms.§Industry-leading protection: NSS Labs Recommended, VB100,AV Comparatives, and ICSA validated security and performance.Ability to leverage latest technologies such as deception-basedsecurity.§Control thousands of applications, block the latest exploits, andfilter web traffic based on millions of real-time UR L ratings inaddition to true TLS 1.3 support.§Prevent, detect, and mitigate advanced attacks automaticallyin minutes with integrated AI-driven breach prevention andadvanced threat protection.§Improved user experience with innovative SD-WAN capabilitiesand ability to detect, contain and isolate threats with Intent-basedSegmentation.§Utilize SPU hardware acceleration to boost security capabilityperformance.ServicesFortiGuard™Security ServicesFortiGuard Labs offer real-time intelligence on the threat landscape,delivering comprehensive security updates across the full rangeFortiCare™Support ServicesOur FortiCare customer support team provides global technicalsupport for all Fortinet products. With support staff in the Americas,DATA SHEET | FortiGate/FortiWiFi ® 40F Series5Specifications(1518 / 512 / 64 byte UDP packets)Firewall Latency (64 byte UDP packets) 4 μs Firewall Throughput (Packets Per Second)7.5 Mpps Concurrent Sessions (TCP)700,000New Sessions/Second (TCP)35,000Firewall Policies5,000IPsec VPN Throughput (512 byte) 1 4.4 Gbps Gateway-to-Gateway IPsec VPN Tunnels 200Client-to-Gateway IPsec VPN Tunnels 250SSL-VPN Throughput490 Mbps Concurrent SSL-VPN Users(Recommended Maximum, Tunnel Mode)200SSL Inspection Throughput (IPS, avg. HTTPS) 3310 Mbps SSL Inspection CPS (IPS, avg. HTTPS) 3320SSL Inspection Concurrent Session (IPS, avg. HTTPS) 355,000Application Control Throughput (HTTP 64K) 2990 Mbps CAPWAP Throughput (HTTP 64K) 3.5 Gbps Virtual Domains (Default / Maximum)10 / 10Maximum Number of FortiSwitches Supported 8Maximum Number of FortiAPs (Total / Tunnel Mode)10 / 5Maximum Number of FortiTokens500Maximum Number of Registered FortiClients 200High Availability ConfigurationsActive / Active, Active / Passive, ClusteringNote: All performance values are “up to” and vary depending on system configuration. 1. IPsec VPN performance test uses AES256-SHA256.2. IPS (Enterprise Mix), Application Control, NGFW, and Threat Protection are measured with Logging enabled.3. SSL Inspection performance values use an average of HTTPS sessions of different cipher suites.4. NGFW performance is measured with Firewall, IPS, and Application Control enabled.5. Threat Protection performance is measured with Firewall, IPS, Application Control, and Malware Protection enabled.(External DC Power Adapter, 12 VDC)Maximum Current100V AC / 0.2A, 240V AC / 0.1ATotal Available PoE Power Budget*N/APower Consumption (Average / Maximum)12.4 W / 15.4 W 13.6 W / 16.6 W Heat Dissipation 52.55 BTU/hr56.64 BTU/hrOperating Temperature 32–104°F (0–40°C)Storage Temperature -31–158°F (-35–70°C)Humidity 10–90% non-condensingNoise Level Fanless 0 dBA Operating Altitude Up to 7,400 ft (2,250 m)Compliance FCC Part 15 Class B, C-Tick, VCCI, CE, UL/cUL, CB CertificationsICSA Labs: Firewall, IPsec, IPS, Antivirus, SSL-VPN* Maximum loading on each PoE/+ port is 30 W (802.3at).DATA SHEET | FortiGate/FortiWiFi ® 40F SeriesCopyright © 2020 Fortinet, Inc. All rights reserved. Fortinet®, FortiGate®, FortiCare® and FortiGuard®, and certain other marks are registered trademarks of Fortinet, Inc., and other Fortinet names herein may also be registered and/or common lawtrademarks of Fortinet. All other product or company names may be trademarks of their respective owners. Performance and other metrics contained herein were attained in internal lab tests under ideal conditions, and actual performance and other results may vary. Network variables, different network environments and other conditions may affect performance results. Nothing herein represents any binding commitment by Fortinet, and Fortinet disclaims all warranties, whether express or implied, except to the extent Fortinet enters a binding written contract, signed by Fortinet’s General Counsel, with a purchaser that expressly warrants that the identified product will perform according to certain expressly-identified performance metrics and, in such event, only the specific performance metrics expressly identified in such binding written contract shall be binding on Fortinet. For absolute clarity, any such warranty will be limited to performance in the same ideal conditions as in Fortinet’s internal lab tests. Fortinet disclaims in full any covenants, representations, and guarantees pursuant hereto, whether express or implied. Fortinet reserves the right to change, modify, transfer, or otherwise revise this publication without notice, and the most current version of the publication shall be applicable. Fortinet disclaims in full any covenants, representations, and guarantees pursuant hereto, whether express or implied. Fortinet reserves the right to change, modify, transfer, or otherwise revise this publication without notice, and the most current version of the publication shall be applicable.FST -PROD-DS-GT40FFGFWF-40F-DAT -R2-202002Order InformationProduct SKU DescriptionFortiGate 40F FG-40F 5 x GE RJ45 ports (including 4 x Internal Ports, 1 x WAN Ports), Max managed FortiAPs (Total / Tunnel) 10 / 5FortiWiFi 40FFWF-40F5 x GE RJ45 ports (including 4 x Internal Ports, 1 x WAN Ports), Wireless (802.11a/b/g/n/ac-W2), Max managed FortiAPs (Total / Tunnel) 10 / 5BundlesFortiGuard BundleFortiGuard Labs delivers a number of security intelligence services to augment the FortiGate firewall platform. You can easily optimize the protection capabilities of your FortiGate with one of these FortiGuard Bundles.Bundles 360 Protection Enterprise Protection UTM Threat Protection FortiCareASE 124x724x724x7FortiGuard App Control Service ••••FortiGuard IPS Service••••FortiGuard Advanced Malware Protection (AMP) — Antivirus, Mobile Malware, Botnet, CDR, Virus Outbreak Protection and FortiSandbox Cloud Service ••••FortiGuard Web Filtering Service •••FortiGuard Antispam Service •••FortiGuard Security Rating Service ••FortiGuard Industrial Service ••FortiCASB SaaS-only Service ••FortiConverter Service•SD-WAN Cloud Assisted Monitoring 2•SD-WAN Overlay Controller VPN Service 2• FortiAnalyzer Cloud2•FortiManager Cloud 2•1. 24x7 plus Advanced Services Ticket Handling2. Available when running FortiOS 6.2。
具有周期维护最小化时间表长的两台平行机调度问题英文
应 用 数 学MAT HEMA TICA AP PL ICA TA2010,23(1):126Tw o Parallel Machines Scheduling wit hPer iodic Ma intenance to M inimize Ma kespan CH EN G Zhen 2min (程贞敏)1,ZHAN G Xi 2juan (张喜娟)1,L I Hong 2xing (李洪兴)2(1.Bus i ness Coll ege ,Bei j in g U nio n U ni versi t y ,Bei j i n g 100025,Chi n a;2.School o f Elec 2t roni c an d In f orm ati on E n gi neeri n g ,D al i an U ni vers it y o f Tech nolo g y ,D al i an 116024,Ch i na )A bstract :A two parallel machine s scheduling problem wher e the two mac hines ar e periodically maintained wit h the objective of minimizing make span is conside red.It is showed that t he wor st 2case b o und of the cla ssical L P T algorithm is 2fo r the ca se t ≤T/3where t is the time to perf orm each maintenance activity a nd T is the time interval betwee n two consecutive mainte nance periods.K ey w or ds :Pa rallel machine sche duli ng ;Periodical mai nt enance ;Makespan ;LP T al 2gori t hmCL C N umber :TP301.6 AMS(2000)Subj ect Cla ssif icat ion :68W99Document code :A A r t icle ID :100129847(2010)01200012061.IntroductionMo st li terat ure on scheduli ng t heory a ssumes t hat machine s are conti nuo usly availabl e.However ,t hi s a ssumption may not be valid i n a real production sit uation.In many production system s ,we usuall y find t hat periodic repair ,periodic i nspection a nd preventi ve mai nt enance are co nduct ed i n t he shops.These maint enance works are performed regularly i n t he p roduc 2t ion syst em s.A s mai nt enance is schedul ed pe riodi cally i n ma ny ma nufact uring syst em s ,t here i s a need t o develop an approach to handle t he scheduling of jobs for processi ng i n syst em s wit h peri 2odic mai nt enance ,which usually have more t ha n one maintenance period.Alt ho ugh t he availa 2bilit y const rai nt is common in practice ,t here are relati vely few papers o n t he topic in t he scheduli ng lit erat ure [1,2].In what follows ,we briefl y review t he related researc h on parall el machi nes.Liao and Chen [3]di scuss a pe riodi c maintena nce scheduling p roblem of mi ni mizi ng ma xim um t ardi ness.In t heir st udy ,t hey assume t hat several maint ena nce interval s are known i n advance.Ji et al.[4]consi der a si mila r p roblem of mini mizi ng makespa n.They prove t hat3Rece ived date :Feb 27,2008F S y N 632T f (6Z 63)N N S F f (6)B y N G Z 2,f ,,,,,j ound a tion item :upporte d b the ational 8High ech Program o China 200AA041a nd ational atural cie nce oundation o China 0774049iogra ph :C HE hen min emale Ha n Hubei lecturer doc tor ma or in applied mathe matics.t he wor st 2ca se bound of t he classical longest processi ng ti me algorit hm i s 2.They also show t hat t here i s no pol ynomial ti me approximation algori t hm wit h a worst 2case bound less t han2.Liao et al.[5]consi der a t wo parallel machi nes p roblem where one machi ne i s not available duri ng a time period.The unavail able time period i s fi xed and known i n a dvance.The objec 2t ive of t he probl em is to mi nimize t he makespa n.For bot h non 2resumable and resumabl e ca 2se s ,t hey part ition t he p roblem i nto four sub 2pro blems ,each of which is solved opt imally by an algori t hm.Alt hough t he periodic mai nte nance parallel scheduli ng proble m i s important ,i t i s relativel y unexplored i n t he scheduli ng li terat ure.In t his paper ,we consider a t wo parall el machi nes problem where t wo machine s are periodic unavaila ble during a ti me period t.The unavailabl e ti me period t i s fi xed a nd known i n advance.The objective of t he probl em i s t o mi nimize t he ma kespa n.For non 2resuma ble case ,we discuss t he worst 2case bound of t he clas 2sic algorit hm L P T for t he problem i s 2.2.Preliminar iesIn t hi s paper we consi der t he t wo i dentical parall el mac hi nes scheduling problem wit h periodic maint ena nce t o mini mize t he makespan.Formall y ,t he consi dered problem can be de 2scribed a s follow s:We are given n independent no n 2re suma ble jobs J ={J 1,J 2,…,J n }which are processed on t wo i dent ical parallel machi nes M 1and M 2.He re no n 2resuma ble means t hat if a job cannot be fi nished before a maintenance activit y ,it has to rest art.The processing ti me of job J i i s p i .All t he jobs are availa ble at time zero.Each machine M i (i =1,2)has t he same mai nt enance act ivit y.The a mount of t ime to perform each mai ntena nce act ivit y is t.Let t he t ime i nt erval between two consecut ive maintenance periods be T.We assume t hat T ≥p i for every i =1,2,…,n ,ot herwi se t he re i s t rivially no feasi ble schedule.We consi der each i nt erval bet ween t wo consecut ive maintena nce act ivitie s as a batch wit h a capacit y T.A schedule δcan be denot ed as δ=(B 11,t 11,B 12,,t 12…,B 1m 1;B 21,t 21,B 22,t 22…,B 2m 2),where t ij i s t he j t h maintenance activit y on machine i ,m 1a nd m 2are t he number s of bat ches on M 1and M 2,re spect ivel y ,B ij i s t he j t h batc h on machine i ,i =1,2.Let C i be t he completion ti me of job J i ,t hen t he objective is to mini mize t he make span ,which i s defi ned a s C max =max {C 1,C 2,…,C n }.Since we onl y consi der t he ca se t ≤T/3,usi ng t he t hree 2field no 2t ation α|β|γof [9],we denote t hi s scheduli ng problem as P 2|pm ,t ≤T/3|C max ,where pm means periodical maintena nce.It can ea sil y be shown t hat t hi s problem i s st rongl y NP 2hard [6],but no approxi mation al gorit hm has been p rovided or analyze d in t he li terat ure.We use t he worst 2case bound to measure t he qualit y of an app roxi mat ion al gorit hm.Spe 2cifi cally ,for t he make span pro blem ,let C A de not e t he ma kespan p roduced by an approximation algorit hm A ,and C O P T be t he makespa n p roduced by an opti mal al gorit hm.Then t he worst 2case bound of al gorit hm A is defined a s t he smalle st const ant c such t hat for any i nst ance I ,C A ≤cC OP T .3.The Worst 2Case Bound of Algorithm L PT f or P 2|pm ,t ≤T/3|C ma xThe followi ng assumptions are made for t he consi dered problem :)T f j f x )T ,,f j 2MAT HEMA TICA AP PL ICA TA 20101he number o obs is i ed and kn own in adva nce.2here are two parallel identical machines i.e.the processing time o each ob is t he same on the two machines.3)The two machi nes are not a vailable periodically.4)The ready ti me s of all jobs a re zero.5)No machine may p rocess more t han one job at a t ime.6)The re i s no priori ty for a ny job.Theorem 1 The periodic mai nt enance parallel machine s problem P 2|pm |C max i s NP 2hard.Pr oof It has been shown t ha t t he t wo parall el machi nes ma kespan 2mini mizat io n p rob 2lem wit ho ut t he rest ri ct ion of availabilit y P 2‖C max i s N P 2ha rd [10].Because t he incl usion of a 2vailabilit y co mplicat es t he problem ,t he problem wit h availa bili t y const raint for P 2|pm |C max i s also N P 2hard.In t hi s section we a nal yze t he L P T algorit hm ,which i s a cla ssical heuri stic for sol vi ng scheduli ng problems.It can be formally described as fol lows.A lgor it hm LP T Re 2order all t he jobs such t hat p 1≤p 2≤…≤p n t he n process t he jobs consec uti vel y as ea rl y a s po ssible.Lem ma 1[7] The wor st 2ca se bound for t he FFD is 3/2,i.e.,b ≤3b 3/2,where b i s t he number of bins (i.e.,batches )o bt ai ned by t he FFD (i.e.,L P T )al gorit hm and b 3i s t he opti 2mal num ber of bins (bat ches )for t he bi n 2packing scheduling problem.Lem ma 2 The opt imal sche dule for t he parall el machi nes problem wit h periodic mai nte 2nance P 2|pm |C max must ha ve t he mi nim um number of batches ,i.e.,it corresponds to an op 2t imal sol ution for t he bi n 2packing problem.Lem ma 3[8] In t he L P T schedule ,if b >b 3,t hen t he processing ti me of each job i n bat 2ches B b 3+1,B b 3+2,…,B b i s not larger t han T/3.Lem ma 4 In t he L P T sche dule ,if b >b 3,t hen t he tot al number of jo bs i n bat che s B b 3+1,B b 3+2,…,B b is not great er t han b 3-1.Lem ma 5 If we a ssign n jobs on single machi ne wit h maint ena nce i n L P T order we can get a schedul e δ1,i n t he same way ,if we a ssign t he same n jobs on t wo parall el machi nes wit h mai nt enance i n L P T order we can get anot her schedule δ2.We assume t hat i n δ1t here are b 1batche s.In δ2t he number s of batches on t wo machi nes a re b 1′and b 2′,respecti vel y.Let b 2=ma x {b 1′,b 2′},i.e.,b 2i s t he larger num ber of batc hes on t wo machi nes.Then we have b 2≤(b 1+1)/2.Pr oof Since b 1a nd b 2a re t he l arger batche s i n δ1a nd δ2,and t he jobs i n δ1a nd δ2are as 2si gned in LP T order ,we can know t hat t he num ber of batche s i n schedule δ2no more t han t hat i n schedule which i s deri ve d by δ1.I f b 1=2s ,which means t hat if we a ssign n jobs on single machi ne ,2s bat hes are occu 2pied ,t hen if we assi gn n jobs o n two paral lel machi nes ,on each machi ne ,t here a re at mo st s bat hes are occupied ,so b 2≤s.i.e.,b 2≤(b 1+1)/2.I f b 1=2s +1,which mea ns t hat if we a ssign n jobs on si ngle machi ne ,2s +1bat he s are occupied ,t hen if we assi gn n jo bs on t wo parallel machine s ,o n each machi ne ,t here are at most +,≤+,≤(+)≤(+),f L 6 If j 23No.1C HEN G Zhen 2min et al.:Two Pa rallel Machines Scheduling wit h Pe riodic Maintenance s 1bathes a re occupied on o ne machine so b 2s 1.i.e.b 2b 11/bining t he t wo sit uat io n s we can k no w t hat b 2b 11/2t hi s co mp lete s t he p roo .emm a we a ssign n obs on single machine with mainte nance a nd a n optimal schedul e is δ31,on t he same ti me ,if we assi gn t he sa me n jobs o n t wo parallel machi nes wit h main 2t enance and a n opti mal schedule is δ32,we assume t hat in δ31t here are b 31bat ches.In δ32t henumber s of batches on two machines are b 1′3and b 2′3,respectively.Let b 23=max {b 1′3,b 2′3},i.e.,b 32i s t he larger number of batches on t wo machines.Then we have b 31/2≤b 32.Pr oof Since t here are b 31bat ches on si ngle machine wit h maintenance to mi nimize t he makes 2pan in t he opti mal schedule δ1,and b 32is t he larger batches in t he opti mal δ2for the two parallel ma 2chines wit h maintenance to minimize t he makespan scheduling problem P 2|pm |C max ,from t he op 2timal schedule we know t hat b 31i s no more t han t he batches derived from t he schedule δ32,which i san opti mal schedule for t he single machine wit h maintenance to minimize t he makespan scheduli ng problem.I f b 31=2s ,which means t hat if we assign n jobs on si ngl e machine ,i n an op timal sched 2ul e δ31t here a re 2s bat ches a re occupied.Then if we assi gn n jobs on t wo parall el machi nes ,oneach mac hi ne ,t here are s bat hes are occupied i n an opti mal schedule δ32,so b 32=s.i.e.,b 31/2≤b 32.I f b 31=2s +1,which means t hat if we assign n jobs o n si ngl e machine ,2s +1bat he s are occupied ,t hen if we assi gn n jobs on t wo parallel machi nes ,on each machi ne ,t here are at most s +1bat he s are occupied ,so b 32=s +1.i.e.,b 31/2≤b 32.Fro m t he above we can know t hat b 31/2≤b 32.Thi s complet es t he proof.Theorem 2 For t he pa rallel machi nes probl em wit h periodic mainte nance P 2|pm |C max ,we a ssume t he makespa n of t he LP T schedule be C LP T ,and t he makespan of a n opti mal schedul e is C L PT ,t hen we have C LP T ≤3C OP T /2+2T +t.Pr oof For t he parallel machine s problem wit h periodic mai nt enance P 2|pm |C max ,wea ssume t hat by L P T algorit hm we can get a schedule δ,and an opti mal sche dule δ3.In δt helar ger number of bat che s occ upied on t wo machi nes is b 2.In δ3t he larger number of bat che soccupied on t wo machine s is b 32.Fi rst ly ,by Lem ma 5and 6we know t hat b 2≤(b 1+1)/2,b 31/2≤b 32,whe re b 1a nd b 31are defined as Lem ma 5and 6.By Lemma 1we know t hat b 1≤3b 31/2.F rom t he above we haveb 2≤b 1+12≤3b 31/2+12≤3b 32+12.That ’s to say b 2≤(3b 32+1)/2.We a ssume t hat t he total proce ssing ti mes of t he jobs in t he last bat ch on t he machi ne where t he l ast jo b is scheduled of t he L P T schedule δa nd t he op timal schedul e δ3be x and y ,re spect ivel y.The makespa n of t he L P T schedule δi s C LP T =(b 2-1)(T +t )+x and t hema kespan of t he opt imal schedule δ3is C O P T =(b 32-1)(T +t)+y.Fro m t he above we knowC LP T =(b 2-1)(T +t)+x ≤3b 32+12(T +t)+x ≤32[(b 32-1)(T +t )+y]+(T +t )-32y +x ≤3C O PT +(T +t )+x.S x ≤T ,L T ≤3O T +T +T f T x f L T f 24MAT HEMA TICA AP PL ICA TA 20102ince then we have C P C P /22t.his com pletes the proo .he ne t we will give the wor st case bound o the P algorithm or the pa rallel m achine s pro blem wit h pe riodi c mai nt enance P 2|pm ,t ≤T/3|C max .Theorem 3 For t he scheduli ng problem wit h periodic mai nt enance P 2|pm |C max ,if t ≤T/3,t he wor st ca se bound of t he L P T algori t hm is 2.Pr oof For t he parallel machine s problem wit h periodic mai nt enance P 2|pm |C max ,wea ssume t hat by L P T algorit hm we can get a schedul e δ,and a n opt imal schedule be δ3.In δt he larger num ber of batches occupied on t wo machi nes i s b 2.In δ3t he lar ger number of bat 2ches occupied on t wo machi nes i s b 32.The makespa n of schedule δand δ3are C L PT and C O P T ,re spect ivel y.Fi rst we shoul d clai m t hat b 2≥b 32.Ot herwi se ,by Lem ma 2we know t ha t b 2≥b 32,t hen if b 2=b 32,it i s obviousl y t hat C L PT ≤2C OP T .The followi ng we only co nsider t he sit uation t hat b 2>b 32.Case 1 b 32=1.By Le mma 6we ha ve b 31/2≤b 32=1,t hen b 31/2=2.By Lem ma 1we have b 1≤3b 31/2,t hen b 1≤3.By Lem ma 5we know t hat b 1≤(b 1+1)/2,t hat ’s to say ,b 2≤2.The n we get b 2=1or b 2=2.I f b 2=1,obviously ,we have C LP T ≤2C O P T .I f b 2=2,by Lemma 4,in t he last batch of L P T sche dule ,t here are at most b 31-1=1job i s left unfin 2ished.Si nce t ≤T/3,t hen we have C LP T ≤T +t +x ≤T +t +x =4T/3+x.Since by Lem ma 3,x ≤T/3,i n t he fi rst bat ch of L PT schedule ,we know on each machine ,t he i dl e ti me i s less t han T/3,t hat ’s to say (∑n i =1p i -x )/2≥2T/3.Then ∑ni =1p i ≥4T/3+bini ng t he t wo i nequaliti es we know t hat C LP T ≤4T/3+x ≤∑n i =1p i .On t he ot her hand ,∑n i =1p i ≤2C O P T .Then we have C LP T ≤2C O PT .Case 2 b 32=2.In t he same way ,by Lemma 1,Lemma 5a nd Lem ma 6we know t hat b 2≤3b 32/2=3,t hen we get b 2=2or b 2=3.I f b 2=3,by Le mma 4,i n t he la st bat ch of L P T schedul e ,t here are at most b 32-1=1job i s lef t unfi nished.Then x ≤T/3.We cl ai m t hat y ≥T/6.Ot herwi se ,if y <T/6,in t he opt imal schedule δ3,we know t hat ∑p i ≤2(T +y)≤2T +T/3=7T/3.On t he ot her hand ,in t he L P T schedule δ,si nce x ≤T/3,t hen t he i dle t ime on t wo machi nes i n t he fi rst a nd second batch i s no more t ha n 2T/3,so we ha ve∑p i ≥223T +23T +x =83+x >7T 3,whic h i s a co nt ravention.Si nce y ≥T/6,x ≤T/3,t hen we haveC L PT =(b 2-1)(T +t)+x =2(T +t)+x <2(T +t)+T/3≤2[(T +t )+T/6]<2[2-1(T +t )+y ]=2C O P T .That ’s to say C L PT ≤2C OP T .Case 3 b 32=3.By t he above lemma s we know t hat b 2≤9/2,t he n we get b 2=4.At t he sa me ti me x <T.The n we haveC LP T =(b 2-1)(T +t)+x =3(T +t)+x<3(T +t )+T <2[2(T +t )+y ]=2C O P T .T ’y L T ≤O T 3=T O T =(3)(T +)+y =3(T +)+y By ≤6,=5=6If =5,5No.1C HEN G Zhen 2min et al.:Two Pa rallel Machines Scheduling wit h Pe riodic Maintenance hat s to sa C P 2C P .Case 4b 2 4.hen C P b 2-1t t .t h e abo ve lemma swe know that b 2then we get b 2or b 2.b 26MAT HEMA TICA AP PL ICA TA2010C LP T=(b2-1)(T+t)+x=4(T+t)+x<2[3(T+t)+y]=2C O PT.I f b2=6,t henC L PT=(b2-1)(T+t)+x=5(T+t)+x<2[3(T+t)+y]=2C OP T.That’s to say C L PT≤2C OP T.Case5 b32≥5.In t hi s wa y,C OP T=4(T+t)+y>2(2T+t).B y Theorem2we know t hat C L PT≤3C OP T/2+2T+t≤3C O P T/2+C O P T/2=2C OP T.Thi s complete s t he p roof.R eferences:[1] Lee C Y,Lei L,Pinedo M.Curre nt trends in deter ministic sche duling[J].Annals of Operations Re search,1997,70:1241.[2] Sc hmidt G.Scheduling wit h limited availability[J].European Jour nal of Operational Re search,2000,121:1215.[3] Liao C J,Chen W J.Single2machine sc heduling with pe riodic maintenance and nonresuma ble jobs[J].Comput.Opns.Re s.,2003,30:133521347.[4] Ji M,He Y,Che ng T C E.Single2machine sche duling with perio dic mainte nance to minimize make span[J].Comput.Op ns.Re s.,2007,34:176421770.[5] Liao C J,Shyur D L,Lin C H.Make span minimiza tio n for t wo parallel mac hines with an availability co n2straint[J].European Journal of Operational Research,2005,160:4452456.[6] Lee C Y.Machine scheduling with an availability const raint[J].Journal of G lobal Optimization,1996,9:3952416.[7] Sim chi2Le v i D.New wor st2case results f or the bin packing problem[J].Naval Re searc h Logistics,1994,41:5792585.[8] Baa se S,G elder A puter Alg orit hms:Introduction to De sign a nd Analysis[M].Boston,M A:Addi2son2Wesley,2000.[9] G ra ha m R L,Lawle r E L,Le nstra J K,Rinnooy Kan A H G.Optimization a nd approximation in dete rmin2istic sequencing a nd sc heduling:a sur vey[J].Annals of Disrete Mathematics,1979,5:2872326.[10] Lenst ra J K,Rinn ooy K a n A H G,Br ucker plexity of machine scheduling problems[J].Annals ofDiscrete Ma thematic s,1977,1:3422362.具有周期维护最小化时间表长的两台平行机调度问题程贞敏1,张喜娟1,李洪兴2(1.北京联合大学商务学院,北京100025;2.大连理工大学电子与信息工程学院,辽宁大连116024)摘要:本文讨论了具有周期维护的两台平行机调度问题,目标函数为最小化时间表长.设T为维护周期,t为每次对机器维护需要的时间,当t≤T/3时,本文证明了对于该问题由L P T 算法得到的最坏误差界为2.关键词:平行机调度;周期维护;时间表长;L PT算法。
海康威视深度视图系列摄像头商品说明书
Conventional security cameras generate large amounts of video every day, but rarely make full use of it. Today, there are better ways to extract valuable data from video. 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The camera supports The queue detection function provides the flexibility to help retail and service businesses adjust the number of cashiers according to real-time queue data, so as to optimize their efficiency and elevate the customer experience.Supermarkets The DeepinView Camera presents the covered area in varied colors, based on foot traffic. The deeper the color, the higher the foot traffic, which means there were more visitors or visitors stayed longer.The heat mapping function helps managers of supermarkets and retail stores identify shelves and displays that attract more customers, evaluate promotion effectiveness, and arrange merchandise in a more strategic way.Heat mappingThe perimeter protection function automates the protection of perimeters and helps users focus their security resources on real threats. Moreover, they can flexibly set the detection area and rules for customized protection.Perimeter protectionThe DeepinView Camera automatically detects persons and vehicles in a monitored area and instantly notifies users of trespassing events. The camera supportsPerson-count threshold: 7!Waiting time threshold: 60 s!20 s30 s35 s40 s45 s50 sDetection of up to 3 queues at a timeThreshold setting of person-counts or wait time Notifications and reportsMinimizing false alarms caused by animals, falling leaves, heavy rain, and other objects Built-in visual and auditory warnings Quick video retrieval by typeVaultsSubstations Mines The DeepinView Camera distinguishes the presence of hard hats on individuals and automatically generates alarms when a violation isdetected. The camera also identifies the color of the hard hat to provide more information for refined personnel management.The hard hat detection function helps managers maintain a high level of safety in work environments where employees are at risk of injury from falling objects, debris, or other forms of impact.Hard hat detectionOn-duty detectionThe on-duty detection function is specially designed for places such as power plant control rooms and hospital nurses' stations, where sufficient trained staff are required around the clock to carry out essential tasks.Displaying the number of persons on dutyAlarm triggering when the staff number is below the requirement The DeepinView Camera automatically detects whether the required number of personnel are present in mission-critical scenarios . The camera supportsConstruction Sites Control Rooms Nurses’ StationsGeneric AI capabilities can't do much to address the application needs in specific business scenarios or workflows.But here, DeepinView Cameras provide structured metadata of on-screen objects so that technology partners can customize intelligent applications based on their customers’ unique needs.Hikvision also helps end users train their algorithms for specific applications by providing an abundant set of models in the AI Open Platform . The trained algorithms can then be loaded directly onto DeepinView Cameras.Contact Hikvision sales representatives any time for more details about the platform.More Business-specific Functions with AIOPObject DetectionModelMixed ModelFood TraceabilityEquipment InspectionAttribute Classification ModeText RecognitionModelDefect RecognitionObstacle AvoidanceCybersecurityand Data ProtectionA Trusted Platform Module (TPM) is designed to secure network devices and used widely across the computer industry. A unique TPM is now built into select DeepinView Cameras, creating and storing cryptographic keys, monitoring changes to camera configurations, and providing protection against cyber attacks. It ensures that only authorized users have access to the video data.The security of select DeepinView Cameras is certified by the Common Criteria (CC), the authoritative body behind the widest recognition of secure and reliable IT products worldwide.DeepinView Cameras also support the IEEE 802.1x, SRTP and SFTP protocols,security logs, and SD card encryption, along with other data protectionTPMTowards a Greener FootprintDeepinView Cameras are free of polyvinyl chloride (PVC) plastic, which is very difficult to break down in natural environments.We also continually refine our product packaging by maximizing the use of eco-friendly, biodegradable materials.Long-Term Performance GuaranteedHikvision’s global after-sales service network and 5-year warranty for DeepinView Cameras provide reliable project maintenance and improve cost efficiency.TandemVu technology iDS-2CD7Ax7G0-XZHS(Y)Professional low-light performance1/1.8’’ large sensor4.7-118 mm ultra-long focal range 25 x optical zoomBuilt-in gyroscope to ensure stable image output 140 dB WDR IP67 ingress protection IK10 vandal resistance-H: Built-in heater for the front iDS-2CD7Ax6G0-IZHS(Y)iDS-2CD70x6G0-AP(/F11)iDS-2CD7A45G0-IZ(H)S(Y)2/4/8 MP4 MPiDS-2CD71x6G0-IZ(H)S(Y) Essential low-light performanceEssential low-light performanceDeepinView CamerasDeepinView CamerasiDS-2CD8A48G0-XZHS(Y)Superior low-light performanceExcellent low-light performanceiDS-2CD8Ax6G0-XZHS(Y)1/1.8’’ large sensor 140 dB WDR P-Iris5 streams to meet a wide variety of applicationsFlexible lens and accessory optionsUp to 1 TB SD, SDHC, or SDXC card1/1.8’’ large sensor2.8-12 mm or 8-32 mm focal range 140 dB WDR P-Iris5 streams to meet a wide variety of applicationsIP67 ingress protection IK10 vandal resistance 12 VDC power outputUp to 1 TB SD, SDHC, or SDXC card1/1.8’’ large sensor 2.8-12 mm focal range 140 dB WDR P-Iris5 streams to meet a wide variety of applicationsIP67 ingress protection IK10 vandal resistance 12 VDC power output-Y: Corrosion resistance with NEMA 4X certificationUp to 1 TB SD, SDHC, or SDXC cardProfessional low-light performanceEssential low-light performanceEssential low-light performanceEssential low-light performanceEssential low-light performanceScenario-specific DeepinView CamerasEducation Sharing Camera ANPR Cameras Dock Management Camera iDS-2CD70x6G0/P-APDS-2CD70x6G0/EP-IHSY iDS-2CD7186G0-IZS/TEA iDS-2CD7A46G0/P-IZHSY/LGX 2/4 MP8 MP4 MP1/1.8’’ large sensor 2.8-12 mm focal range 140 dB WDR P-Iris5 streams to meet a wide variety of applicationsPTRZ and anti-reflection bubble IP67 ingress protection IK10 vandal resistance 12 VDC power output-Y: NEMA 4X certification; supports the Wiegand interfaceUp to 1 TB SD, SDHC, or SDXC card1/1.8’’ large sensor2.8-12 mm or 8-32 mm focal range 140 dB WDR P-Iris5 streams to meet a wide variety of applicationsIP67 ingress protection IK10 vandal resistance 12 VDC power output-Y: NEMA 4X certification; supports the Wiegand interfaceUp to 1 TB SD, SDHC, or SDXC cardiDS-2CD75x7G0/P-XZHS(Y)iDS-2CD7Ax6G0/P-IZHS(Y)4 MP2/4 MPHikvision DeepinView Series CamerasDeeper Intelligence beyond the EdgeHikvision Europe Dirk Storklaan 3 2132 PX Hoofddorp The NetherlandsT +31 23 5542770*********************Hikvision France1 Rue Galilée 93160Noisy-le-GrandFranceT +33 (0)1 85330450*********************Hikvision PolandBusiness Garden, BudynekB3ul. Żwirki i Wigury 16B,02-092 WarszawaT +48 4600150*********************Hikvision RomaniaSplaiul Independentei street291-293, Riverside Tower,12th floor, 6th district,Bucharest, RomaniaT +31235542770/988**************************Hikvision BelgiumNeringenweg 44,3001 Leuven, BelgiumT +31 23 5542770**********************Hikvision HungaryBudapest, Reichl Kálmán u. 8,1031, HungaryT +36 1 323 7650*********************Hikvision CzechVyskočilova 1410/1140 00 Praha 4 – MichleCzech RepublicT +42 29 6182640*********************Hikvision GermanyWerner-Heisenberg Str. 2b63263 Neu-lsenburg,GermanyT +49 69 401507290************************06。
Oracle Real Application Testing 产品说明书
ORACLE REAL APPLICATION TESTINGK E Y B E N E F I T S A N D F E A T U R E STHE INDUSTRY’S LEADING SOLUTION FOR PROACTIVE PERFORMANCE MANAGEMANT AND REAL WORKLOAD CAPACITY PLANNING Oracle Real Application Testing is an extremely cost-effective and easy-to-use proactive performance management solution that enables businesses to fully assess the outcome of a system changes in test or production. Oracle Real Application Testing enables predictable application quality of service and helps avoid performance problems with closed loop automated tuning. It facilitates accurate consolidation and capacity planning and improves business agility with faster and risk free new technology adoption. Oracle Real Application Testing significantly enhances DBA productivity by simply and easily validating database environment changes. Oracle Real Application Testing is comprised of the following features: SPA Quick Check, SQL Performance Analyzer, Database Replay, Concurrent Database Replay and the Database Consolidation Workbench.K E Y B E N E F I T S•Increased business productivity through automation and zero-scripting.•Improved quality of service of mission critical databases through quick validation of system changes directly on production•Enables business agility through significantly reduced risk and costs •Highest quality production-scale secure testing solution.K E Y F E A T U R E S•SPA Quick Check•SQL Performance Analyzer (SPA) •Database Replay•Concurrent Database Replay •Workload scale-up and custom workload creation support •Database Consolidation Workbench •Integration with Oracle’s Test Data Management Data Masking functionality and Application Testing Suite SPA Quick CheckSPA Quick Check allows customers to easily and quickly validate system changes directly on production databases without impacting end-users. It is available starting from Oracle Enterprise Manager 12c Database Plug-in (12.1.0.5) and supports all Oracle Databases Releases 11.2 and above. SPA Quick Check supports private-scoped, optimized trials, and change-aware intelligent workflows allowing administrators to verify routine DBA tasks like optimizer statistics gathering, validating SQL Profiles, and init.ora parameter changes with a single click of a button. It is highly optimized and resource controlled, consuming an order of magnitude fewer resources, making it viable to test directly on production.SQL Performance AnalyzerSPA provides fine-grain assessment of an environment change on SQL execution plans and statistics by running the SQL statements in isolation and serial manner in before-change and after-change environments. SPA functionality is well integrated with existing SQL Tuning Set (STS), SQL Tuning Advisor, and SQL Plan Management functionality. As a result, SPA completely automates and simplifies the manual and time consuming process of assessing the impact of a change on even extremely large SQL workloads (thousands of SQL statements) and automating the remediation of any SQL regressions as a result of the system change. Figure 1 below illustrates a typical SPA Report.R E L A T E D P R O D U C T SReal Application Testing deliversmaximum benefits when used with thefollowing Oracle products:•Oracle Diagnostics Pack•Oracle Tuning Pack•Oracle Test Data Management Pack•Oracle Database LifecycleManagement PackFigure 1. SQL Performance Analyzer Report .Examples of usage for SPA include:∙Database upgrade, patches, and initialization parameter changes∙Configuration changes to the operating system, hardware, or database∙Schema changes such as adding new indexes, partitioning or materialized views∙Validating optimizer statistics refresh or SQL tuning actions∙Exadata simulation for DW/DSS workloads∙Database consolidation to a single or Container Database∙Database migration to CloudDatabase ReplayDatabase Replay workload capture is performed at the database server level andtherefore can be used to assess the impact of any system change or use case in thedatabase tier such as:∙Database upgrades, patches, parameter, schema changes∙Configuration changes such as conversion from a single instance to RAC, ASM∙Storage, network, interconnect changes, Operating system and hardware migrations(including to Exadata)∙Database consolidation to a single or Container Database∙Database migration to cloud∙Workload stress testing, capacity planning, and scale-up testingDatabase Replay workflow consists of the following three phases that are describedbelow:i. Workload CaptureWhen workload capture is enabled, all external client requests directed to the Oracleserver are stored into compact “capture” files on the database host file system whileincurring negligible overhead. These files contain all relevant information about the callneeded for replay such as SQL text, bind values, wall clock time, SCN, etc. Theworkload that has been captured on Oracle Database Release 9.2.0.8.0 and higher canbe replayed on Oracle Database Release 11g and higher.ii. Workload ReplayBefore performing workload replay, the test system has the intended system changeapplied and database restored to the point in time before the capture. Once replay is•initiated, a special client program called the “replay client” replays the workload from the processed files. It submits calls to the database with the exact same timing and concurrency as in the capture system and exercises the exact same load on the system as seen in the production environment.iii. Analysis and ReportingExtensive reports that encompass both high-level summary and detailed drill-down information in terms of errors, performance and data divergence are provided to help understand how the replay fared in comparison to capture or other replays. Basic performance comparison reports between replay and capture or other replays are provided and for advanced analysis AWR, ASH, and Replay Compare Period reports are available.Concurrent Database ReplayA chosen database consolidation strategy can be validated using Concurrent Database Replay thereby minimizing its associated risk. Concurrent Database Replay supports simultaneous replay of workloads captured from one or multiple systems. These captured workloads can be from any database release or operating system on which workload capture is supported. Some typical use cases for Concurrent Database Replay include:∙Schema consolidation into a single database∙Database consolidation using Oracle Pluggable Databases∙Testing impact of enabling Resource Manager in a consolidated environmentFigure 2 below illustrates Oracle Enterprise Manager 13c, Database Replay Summary Page for a successfully completed concurrent replay.Figure 2: Concurrent Database Replay Summary PageCapacity Planning with Database ReplayDatabase Replay supports workload stress testing, capacity planning, scale-up testing using any of the three methods namely, Time Shifting, Workload Folding, and SchemaRemapping. Time Shifting workload scale-up is useful to conduct system stress testing by adding workloads to an existing workload capture, scheduling them to align their peak activity or as intended, and replaying them concurrently. Workload folding method consists of slicing an existing captured workload into two subsets by specifying a point in time within the captured duration. Then one can double the workload by folding the workload along this specified point-in-time. This is done by submitting simultaneous replays (consolidated replay) of the created subset workloads on the target database. This consolidated database replay effectively allows one to double the current workload without the need to use scripting or supplying binds. Workload Folding scale-up method is suitable for applications where individual transactions are mostly independent of each other. Schema Remapping workload scale-up method enables you to perform scale-up testing by remapping database schemas. This method is useful in cases when you are deploying multiple instances of the same application such as a multi-tenant application, or adding a new geographical area to an existing application. Additionally, Oracle Enterprise Manager Cloud Control 13c provides comprehensive support for the above mentioned Database Replay capacity planning and scale-up testing techniques by providing an intuitive graphical interface. This allows customers to easily and accurately size their system for future growth and consolidation while maintaining or improving their business SLAs.Database Consolidation WorkbenchDatabase Consolidation Workbench is a comprehensive end-to-end solution for managing database consolidation. It provides a risk-free and accurate approach to consolidation by eliminating guess work and human errors. The Database Consolidation Workbench uses historical workload metrics - both database and host - to produce an optimal consolidation plan that maps many sources databases to fewer databases (both non-CDB/CDB) or servers on existing or yet to be procured hardware.The Database Consolidation Workbench also automates the entire database consolidation implementation process - saving DBAs the manual error-prone effort of consolidation. The different modes of consolidation supported (e.g., RMAN, Data Pump, Cross Platform Transportable Tablespaces, Data Guard) in the Workbench enable IT administrators and DBAs to implement the chosen consolidation strategy with minimal downtime based on the business needs. The ability to execute the consolidation process in parallel in an automated fashion means that the business can realize consolidation savings faster and reduce operating costs more quickly.After consolidation, the Database Consolidation Workbench uses SQL Performance Analyzer (SPA) to validate the performance of the migrated databases to ensure the required quality of service and SLAs are being met.Real Application Testing and Oracle Data Masking Pack IntegrationReal Application Testing and Oracle Data Masking Pack functionality integration provides users with the ability to perform secure testing in accordance to data privacy regulations in situations where data in production needs to be shared by non-production users due to organizational or business requirements.LicensingReal Application Testing features are accessible through Oracle Enterprise Manager,and command-line APIs provided with Oracle Database software. The use of these andother features described in the product licensing documentation requires licensing of theOracle Real Application Testing option regardless of the access mechanism.C O N T A CFor more information about [insert product name], visit or call +1.800.ORACLE1 to speak toan Oracle representative.C O N N E C T W I T H U S/oracle /oracle /oracle Copyright © 2016, Oracle and/or its affiliates. All rights reserved. This document is provided for information purposes only, and the contents hereofwarranties or conditions, whether expressed orally or implied in law, including implied warranties and conditions of merchantability or fitness for a particular purpose. We specifically disclaim any liability with respect to this document, and no contractual obligations are formed either directly or indirectly by this document. This documentmeans, electronic or mechanical, for any purpose, without our prior written permission.Oracle and Java are registered trademarks of Oracle and/or its affiliates. Other names may be trademarks of their respective owners. Intel and Intel Xeon are trademarks or registered trademarks of Intel Corporation. All SPARC trademarks are used under license and。
Synopsys TestMAX DFT 设计测试工具简介说明书
DATASHEET Overview Synopsys TestMAX DFT is a comprehensive, advanced design-for-test (DFT) tool that addresses the cost challenges of testing designs across a range of complexities. TestMAX DFT supports all essential DFT, including boundary scan, scan chains, core wrapping, test points, and compression. These DFT structures are implemented through TestMAX Manager for early validation of the corresponding register transfer level (RTL), or with Synopsys synthesis tools to generate netlists. Multiple codecs and architectures are supported that address the need for ever-higher levels of test data volume, test time reduction, and fewer test pins. TestMAX DFT leverages Synopsys Fusion Technology to optimize power, performance and area for the design, minimizing the impact from DFT. Key Benefits • Lowers test costs • Enables high defect coverage • Accelerates DFT validation using RTL • Minimizes impact on design power, performance, and area • Preserves low-power design intent • Minimizes power consumption during test • Integration and verification of IEEE1687 network and compliant IP • Integration and verification of IEEE 1500 access network Key Features • High test time and test data reduction • Patented, powerful compression technologies • RTL generation with TestMAX Manager • Fused into Design Compiler ® and Fusion Compiler™ for concurrent optimization of area, power, timing, physical and test constraintsComprehensive,advanced design-for-test (DFT)TestMAX DFT Design-for-Test Implementation• Hierarchical scan synthesis flow support• Pin-limited test optimizations• Unknown logic value (X) handling• Location-aware scan chain reordering during incremental compile• Core wrapping with shared use of existing core registers near core I/Os• Analysis-driven test point insertion using TestMAX Advisor• Flexible scan channel configurations to support multi-site testing and wafer-level burn-in• Multiple compression configurations to support different testers and packages with different I/O• Boundary scan synthesis, 1149.1/6 compliance checking and BSDL generation• Consistent, comprehensive DRC shared with ATPG• Enables TestMAX ATPG for compressed pattern generation• IEEE 1687 ICL creation and verification• Hierarchical IEEE 1687 PDL pattern porting• Automated pattern porting and generation of tester-ready patterns in WGL/STIL/SVF and post-silicon failure diagnostics02468101214304K436K 653K 702K 728K 1M 1.2M 3.5MT e s t e r c y c l e s (m i l l i o n s )Standard scan Scan with compression Design sizeFigure 1: TestMAX DFT delivers high test time and test volume reductionHigh Test Time and Test Data ReductionTestMAX DFT reduces test costs by providing high test data volume compression (Figure1). Using Synopsys’ patented TestMAX DFT compression architectures, TestMAX DFT saves test time and makes it possible to include high defect-coverage test patterns in tester configurations where memory is limited. With the industry’s most area-efficient solution, TestMAX DFT has virtually no impact on design timing and results in the same high test coverage as provided by standard scan (Figure 2a). For additional test time and data reduction, TestMAX DFT implements test points within synthesis, via its transparent links to TestMAX Advisor for powerful test point analysis and selection.Pin-Limited TestTo accommodate designs that require a limited number of test data pins either at the top-level or per core, TestMAX DFTgenerates an optimized architecture that ensures high quality without incurring extra test data. Several factors limit the number of available test pins, including tighter form factors, multi-site testing to target multiple die simultaneously, and core-basedmethodologies with multiple embedded compressor-decompressors (codecs). These types of techniques minimize the number of chip-level test pins available to each codec. To provide high test data volume and test application time reduction for these pin-limited test applications, TestMAX DFT generates a low-pin tester interface. Use TestMAX DFT to minimize the required number of scan I/O for pin-limited testing (Figure 2b).Input pattern values Output pattern values Input pattern valuesOutput pattern valuesFigure 2a: (left) Codec optimized for high pin count; Figure 2b. (right) Codec optimized for pin-limited testingDFT Implementation into RTLIn conjunction with TestMAX Manager, TestMAX DFT offers early validation of complex DFT logic and architecture by producing RTL. For easy adoption, commands are similar to Synopsys’ widely deployed standard scan synthesis flow. TestMAX DFT generates compression logic directly into RTL, which can be verified with the VCS® simulator or other Verilog simulation tools. In addition, all test and design constraints are automatically generated for synthesis tools. Validation of RTL DFT ensures key compression logic and connections with other DFT logic such as logic BIST and memory BIST operate as specified, prior to synthesis, leading to very high and predictable test coverage and test compression results.DFT SynthesisThe TestMAX DFT synthesis flow is based on the industry’s most widely deployed standard test synthesis flow and incorporates Test Fusion technology. TestMAX DFT synthesizes DFT logic directly from RTL or gates into testable gates with full optimizationof synthesis design rules and constraints. All test and compression requirements specified prior to the synthesis process aremet concurrently with area, timing and power optimization. TestMAX DFT also enables TestMAX ATPG to seamlessly generate compressed test patterns while achieving high test quality.Complete DFT Rules CheckingFor maximum productivity, and prior to executing TestMAX DFT, TestMAX Advisor enables designers to create “test-friendly” RTL. TestMAX Advisor identifies DFT rules violations early in the design cycle during the pre-synthesis stage to avoid design iterations. Specifically, TestMAX Advisor validates that the design is compliant with scan rules to ensure operational scan chains and the highest test coverage. The violations can be diagnosed using its powerful integrated debugging environment that enables cross-probing among violations, RTL and schematic views. For flows within Design Compiler and Fusion Compiler products, TestMAX DFT provides comprehensive design rule checking for scan and compression logic operation.Fusion Design Platform For Concurrent Optimization Of Area, Power, Timing, Physical And Test ConstraintsWith Synopsys’ synthesis flow (Figure 3), scan compression logic is synthesized simultaneously with scan chains within the Fusion Design Platform. Location-based scan chain ordering and partitioning provides tight timing and area correlation with physical results using Fusion Compiler or IC Compiler. This enables designers to achieve area, power, timing and DFT closure simultaneously. TestMAX DFT writes detailed scan chain information which Synopsys’ physical design tools read, which then perform further optimizations to reduce area impact and decrease overall routing congestion (Figure 4).RTL Creation FlowNetlist Creation Flow Figure 3: Test compression flowIntegrating DFT resources into a complex multi-voltage design can be a time-consuming and error-prone process without automation tailored for low-power flows. Once voltage domain characteristics of the design with IEEE 1801 (unified power format or UPF) are specified, TestMAX DFT automatically inserts level shifters and isolation cells during scan chain implementation. To reduce routing congestion and area impact of the DFT logic, TestMAX DFT minimizes both scan chain crossings between power/voltage domains and the number of level shifters inserted.Figure 4: These screen captures show TestMAX DFT results without the routing congestion associated with standard scanHierarchical Scan SynthesisTo handle test synthesis of very large designs, some level of abstraction is required so that the system/chip integrator can reduce design time. By abstracting the DFT information in a test model, along with timing and placement information, TestMAX DFT enables quick hierarchical test implementation of multi-million gate designs.Boundary Scan Synthesis and Compliance Checking to the 1149.1/6 Standard TestMAX DFT delivers a complete set of boundary scan capabilities including:• TAP and BSR synthesis• Compliance checking to the IEEE 1149.1/6 standard• Boundary Scan Description Language (BSDL) file generation• Functional and DC parametric pattern generation for manufacturing testIntegrated Setup of TetraMAX ATPG for Pattern GenerationTestMAX DFT transfers all information about the scan compression architecture and test operation to TestMAX ATPG. Working together, TestMAX ATPG and TestMAX DFT automatically generate compressed, power-aware test patterns with highest test coverage.©2021 Synopsys, Inc. All rights reserved. Synopsys is a trademark of Synopsys, Inc. in the United States and other countries. A list of Synopsys trademarks isavailable at /copyright.html . All other names mentioned herein are trademarks or registered trademarks of their respective owners.。
一心多用的英语作文
一心多用的英语作文Multitasking has become an integral part of our daily lives in the modern world. The ability to juggle multiple tasks simultaneously has become a highly valued skill in both professional and personal realms. While the concept of multitasking may seem like an efficient way to maximize productivity, it is important to examine the potential benefits and drawbacks of this practice.On the surface, multitasking appears to be a valuable asset. In a fast-paced and ever-changing environment, the ability to handle multiple responsibilities at once can be seen as a sign of adaptability and resourcefulness. Employees who can effectively multitask are often viewed as more valuable assets to their organizations, as they can potentially accomplish more in a shorter period of time.Moreover, the rise of technology has further enabled and encouraged multitasking. With the ubiquity of smartphones, laptops, and various digital tools, individuals can now seamlessly transition between different tasks and activities with just a few clicks or taps. This convenience has led many people to believe that multitasking isa necessary and desirable skill to cultivate.However, the potential drawbacks of multitasking should not be overlooked. Numerous studies have shown that the human brain is not actually capable of performing multiple tasks simultaneously with equal efficiency. Instead, the brain switches back and forth between different tasks, resulting in a phenomenon known as "task-switching."This task-switching can lead to a decrease in overall productivity and performance. When the brain is constantly shifting between different tasks, it becomes more difficult to maintain focus and concentration on any one task. This can result in increased errors, reduced attention to detail, and a longer time to complete each individual task.Furthermore, multitasking can have negative impacts on cognitive function and mental well-being. Constantly shifting between tasks can lead to increased stress, anxiety, and feelings of overwhelm. The constant stimulation and divided attention can also contribute to a decrease in the ability to engage in deep, focused work, which is often necessary for complex problem-solving and creative thinking.In addition, multitasking can have detrimental effects on interpersonal relationships and social interactions. When individuals are constantly divided between multiple tasks, they may be lesspresent and attentive in their interactions with others. This can lead to a perceived lack of engagement and can negatively impact the quality of personal and professional relationships.Despite these potential drawbacks, it is important to acknowledge that multitasking is not inherently good or bad. The effectiveness of multitasking largely depends on the specific tasks involved and the individual's ability to manage their cognitive resources effectively.For example, some tasks may be more suitable for multitasking than others. Simple, routine tasks that do not require a high level of cognitive effort may be more amenable to concurrent execution. On the other hand, complex, cognitively demanding tasks may suffer from the divided attention and decreased focus associated with multitasking.Additionally, individual differences in cognitive abilities, personality traits, and work styles can also play a role in the effectiveness of multitasking. Some individuals may be better equipped to handle the demands of multitasking, while others may find it more challenging and detrimental to their overall performance and well-being.To maximize the benefits of multitasking while mitigating the potential drawbacks, it is important to develop strategies and practices that promote effective task management and cognitivecontrol. This may involve prioritizing tasks, setting clear boundaries and time limits, minimizing distractions, and engaging in regular breaks to recharge and refocus.Furthermore, it is crucial to cultivate a deeper understanding of one's own cognitive strengths and limitations. By being self-aware and mindful of how multitasking affects their individual performance and well-being, individuals can make more informed decisions about when and how to engage in multitasking.In conclusion, the concept of multitasking is a complex and multifaceted issue that requires careful consideration. While the ability to handle multiple tasks simultaneously can be a valuable skill in certain contexts, it is important to recognize the potential drawbacks and to develop strategies that optimize the benefits of multitasking while mitigating its negative impacts. By striking a balance and adopting a more nuanced approach to multitasking, individuals can enhance their overall productivity, cognitive function, and well-being in the face of the demands of the modern world.。
ipd 货架技术流程
ipd 货架技术流程**Introduction**In the dynamic world of manufacturing and supply chain management, Integrated Product Development (IPD) holds a pivotal position. IPD is a collaborative approach that focuses on cross-functional teams, market needs, and concurrent engineering to develop products that are competitive and profitable. One of the critical components of IPD is the shelf technology process, particularly in the context of IPD racks. These racks, optimized for efficiency and flexibility, play a vital role in ensuring the smooth flow of materials and components throughout the manufacturing cycle.**The IPD Shelf Technology Process**The IPD shelf technology process begins with a thorough understanding of the product's lifecycle. This involves identifying the raw materials, components, and assemblies required for the product's production. Based on this information, racks are designed to optimize storage capacity, accessibility, and ergonomics. The racks are thenintegrated into the overall manufacturing layout, takinginto account factors like workflow, material handling, and safety.During the design phase, it's crucial to consider the shelf's durability and longevity. This ensures that the racks can withstand the rigors of daily operations and maintain their structural integrity over time. Additionally, the design must account for easy maintenance and repairs, minimizing downtime and maximizing productivity.The implementation of the IPD shelf technology process involves several stages. These include the procurement of materials, assembly of the racks, installation in the manufacturing facility, and final testing. Each stage is carefully monitored to ensure compliance with design specifications and safety standards.Once the racks are in place, they undergo regular inspections and audits to identify any potential issues or areas of improvement. This continuous improvement cycle is essential for maintaining the efficiency and profitabilityof the manufacturing process.**The Role of Technology in IPD Shelving**Modern technology plays a crucial role in enhancing the IPD shelf technology process. Automation and robotics are being increasingly used in rack assembly and installation, improving accuracy, speed, and worker safety. Additionally, advanced analytics and data tracking systems provideinsights into shelf performance, allowing for proactive maintenance and optimization.**Challenges and Solutions**Despite the benefits of IPD shelf technology, there are challenges that need to be addressed. Space constraints, varying product sizes and weights, and the need for rapid adaptability to market changes can pose significant hurdles. To overcome these challenges, manufacturers are turning to modular and adjustable rack systems that provideflexibility and scalability.**Conclusion**In conclusion, the IPD shelf technology process is a critical component of any manufacturing operation seekingto improve efficiency, profitability, and product quality. By optimizing the design, implementation, and maintenanceof IPD racks, manufacturers can ensure a smooth andefficient flow of materials, components, and finished products. With the help of modern technology, the future of IPD shelving looks bright, promising even greater levels of automation, intelligence, and adaptability.**IPD货架技术流程深度解析****引言**在制造和供应链管理这个充满变化的世界里,集成产品开发(IPD)占据着举足轻重的地位。
ProtoTRAK TRAK LPM 产品手册说明书
More than just a VMC...It’s a machining system forLow Volume / High Mix production.The TRAK LPM is a machining system that integrates thecontrol, machine, tooling and workholding. It gives ProtoTRAK machinists the tools they need to compete and win on the strength of their know-how and skill.How You Compete in Low Volume / High Mix Production Jobs Reduce Labor Hours Spent in SetupDo Job Change-Overs in MinutesThe TRAK LPM reduces the idle time to an absolute minimum so the machine can keep cutting chips. Other VMCs force you to leave the spindle idle while setting up tools and locating parts.The TRAK LPM integrates practical tools to guide you through setups. Other VMCs require more labor-intensive, time-consuming setups.THE TRAK LPMYour ProtoTRAK machinists can program all but the most complex parts...right on the shop floor.• Save the time and cost of routing through a CAD/CAM process • Keep your skilled workers incontrol of how parts get madeThe ProtoTRAK PMX is Always Easy to UseTHE TRAK LPM SYSTEMStaged View for Concurrent Programming and Setup• Program a future job while you’re tending a job that’s already running• Keep the spindle running while setting up almost everyaspect of the next job• Make quick work of part programming in a process the machinist controls • Assure accuracy by usingblueprint data for dimensionsConvert DXF andParasolid FilesSOLID SelectRotatePan3 AXISEVENT INCH Pin 27767FitUndoDrag ZoomSolid/WireFace ViewSet ZBOX ZOOM• Precise positioning in seconds• Repeatable part locationseliminate touching off partsJergens ® Ball Lock System Installed for You• Focus your attention onlyon what needs doing next• Work with confidence without worrying that you’ll forget something importantChecklists Give You Feedback on Your Progress• Saved with the programs so you have instant access whenyou need them• Don’t waste time reinventingwhat you’ve already donePhotos and Notes of YourPast Setups• Run the program with the control handwheel on your first partTRAKing is the Fastest, Surest Way to Prove outa SetupPrograms just like a ProtoTRAK (because it is)The ProtoTRAK that is completely dedicated to Low Volume / High Mix jobsProtoTRAK PMX CNCNot only does the ProtoTRAK PMX have the ability to work on two programs at once, it keeps themachine running for most of the setup of that future job.A simple selection on the control and you’ll be programming and setting up future jobs while a job is running.Staged ViewSetup with a DifferenceProgram Set Up you do those tasks for the In Machine Set Up you do those few things that require the machine to be idle.The ProtoTRAK PMX keeps track of what you’ve done and what needs doing. You’ll be able to focus on a couple of things when the machine is idled.Setup ChecklistThe ProtoTRAK PMX knows the reference tool so you can quickly set Z values for each tool.Reference Tool PresetThe ProtoTRAK PMX knows the positions for the Jergens ® Ball Locks so you can locate the fixture and workplace quickly and precisely.Fixture ReferenceAdvanced Capability Made Easy G-Code EditorMake quick adjustments toG-Code right at the machine.NetworkingAssure print control by keepingprograms in authorized filestorage locations.DXF File ConversionUse the print data to makeprogramming easier.Parasolid File ConversionGo right from solid file to part program in a process that is quick and easy.Graphical Tool Path SimulationSee the entire tool path to assurewhat you’ve programmed is whatyou’ll cut.4TH Axis SimultaneousEven complex geometries aremade easier to setup and run.The ProtoTRAK PMX knows the Ball Lock receiverlocations. Simply reference the part to the fixture, and then load the offsets into the fixture management screen.Within seconds your fixture is positioned within 0.0002’’ and secured with 2250 lbs of clamping force. Follow this simple process and you never need to touch off a part in an idled machine!The optional 4th axis is easily mounted with the Ball Lock System.Multiple fixtures are referenced using the preset locations.Fixture plate with integrated vice for quick setups.Optional Locating Guide Assembly allows you toeasily reference your own features.Fence and precision standoffs for quick, repeatable changes.With a little ingenuity in fixtures, you will slash the time that’s wasted in set up!Follow this simple process and you will never have to touch off tools in an idled machine!standard with every TRAK LPM.Setting the Z Depths of each tool is simple. Just enter the offsets from the reference toolas you touch off.Each TRAK LPM comes with its own reference tool. The tool’s Z dimension is loaded into the ProtoTRAKPMX for you at our factory.Under Your ControlUnlike any other VMC, the TRAK LPM keeps you in control every step of the way. You can work fast, with confidence.Part graphics provide feedback as you program,bringing mistakes to your attention for immediate correction.All green, ready to go!Toolpath Verify exposes any problems in toolpath, including the non-programmed positioning and tool change moves. Give your skilled ProtoTRAK machinists the control they need, and your shop will produce Low Volume/ High Mix parts faster and better than the shops that run a conventional VMC.The Checklist keeps track of what you’ve done and what remains.TRAKing allows you to run your parts at the speed in which you crank the convenient controlhandwheel. It is simply the purest way to make sure everything is correct before you press “GO.”Box-shaped spindlehead castingStiff column and bed box construction 5 tee slots(instead of the usual 4)Class PLinear GuidesExtra wide Y axis supportLarge contacting surfacesCasting features heavyinternal ribbingWide base footprintStrong and rigidMachine Construction40mm diameterprecision ground ballscrews Direct coupled motors maximize efficiencyand precision while minimizing elastic backlash Dual angular contact bearings pretensionthe ballscrews to minimize thermal expansionLinear guides provide smooth, accurate positioningHigh-precision cartridge-type spindle • Four precision angular contact bearings • ABEC 9, P2 (radial run out)• Permanently lubricated – requires no maintenanceTool Carousel16-station carousel tool changerTelescoping CoversProtects all linear guides, ballscrewsand motors.Air and Spray GunsConvenient built-in air and spray gunsNEMA 12NEMA 12 (equivalent) houses the clean, well-organized control andmachine electrical systems.Chip AugerFluid PumpsDual 0.68 hp pumps provide coolant for machining and the built-in wash down nozzles.System OptionsFixture CartHigh quality cart by HuotManufacturing. Lip height and lengthmatches TRAK LPM table positionduring fixture change.4th AxisThe 4th axis hardware is mountedon fixture plates for easy setup.Mobile Tool Setting CartOne comes with every TRAK LPM,you would buy this only if you wantan additional cartVise StopIncludes mag base and 1”, 2” & 3”extensionsBall Lock Liners (Set of Eight)For fixture plates. High precision forPrimary Locating and lower precisionfor secondary locations.Ball Lock Locating GuideAssemblyFor locating your current fixtureson the TRAK LPM table using the balllock system and locating holeson the table. Includes three stops.Ball LockClamping DeviceSet of 4 (4 also come standard)Fixture PlatePrecision plate with primary liners.Comes in three sizes:• Small (shown above) - 16” x 15.5”• Medium – 16” x 24”• Large – 16” x 32”Fixture Plate Set UpFor Kurt D675 ViseIncludes plate, fence, stopand hardware. Does not include vise.Retention Knobs (Cat 40)Set of 16 (Shown installed)Features and SpecificationsLPM SpecificationsOverall L x W x H 13.1’ X 7.4’ X 8.6’Table size 35 3/8" X 19 5/8"Tee slots: 5 x .71" x 3.94" no. x width x pitch Table max load 1000 lbs.Travels: X x Y x Z 31" x 18.5" x 21"Max spindle 24" nose to table Min spindle 3 3/8" nose to table Max clearance 19 1/4" spindle center to columnMax Rapid speed 800 x 800 x 700 X x Y x Z ipm Electrical 208-240V / 78 amps requirements or 415-440V / 44 amps (requires optional transformer)Tool holder type CAT40 Max RPM 8000Tool Capacity 16Max tool weight 15 lbs incl holderMax tool diameter 3.14Tool clamping 1500 lbs force (at 90psi) Tool carousel 18" to table HP Peak 15HP Continuous 10Weight/Shipping Lbs. 7650 / 8000Standard Features• Internal wash down nozzles • Air gun• Wash down gun • Halogen work lights • Auto lube system• Mobile Tool setting system (incl. cart)• Belt drive spindle • Coolant pump • Wash down pump• Fixture clamping devices – set of 4• Status lights • Rigid tapping• Chip Auger (accommodates a third party 12” oil skimmer)• Air blast to clear chips from spindle • Coolant tank 45 gal.Options• Integrated 4th Axis • Fixture Cart• Fixture plates – small, medium and large • Vise fixture kit – fixture plate, fence, stop • Vise Stop Assembly – incl 1”, 2”, 3” extensions • Fixture clamping devices – additional set of 4• Sets of ball lock liners, primary and secondary• Ball lock locating guide• Retention knobs – CAT 40 – set of 16 • Offline programming • DXF File converter• Parasolid file converter • Transformer 440 to 220• BT40 ATC grippersProtoTRAK PMXHardware Specifications• Jog wheel for TRAKing and positioning • 12.1" color active-matrix screen • Industrial-grade Celeron ® processor • 512 MB Ram• 4 User USB connectors • Override of program feedrate • LED status lights built into display • RJ45 Port with 10/100 Ethernet • Override of program spindle speed • 4th axis interfaceSoftware Features - General Operation• Clear, uncluttered screen display • Prompted data inputs • English language – no codes • Soft keys - change within context • Windows ® operating system • Color graphics with adjustable views • Inch/mm selectable• Convenient modes of operation • Absolute Home location • Spindle load indicator• Reference to ball lock locations on table • Dimension reference indicator • Selectable view between Current and Staged programs* Dimensions in inchesOverall DimensionsMachine Set Up Mode Features• Advanced diagnostic routines• Software travel limits set in the factory • Prompted Tool loading and ATC Management• Checklist to assure nothing is forgottenRun Mode Features• TRAKing• 3D G code file run with tool comp • Real time run graphics with tool icon • Countdown clock/run time estimator • Error alarms prevent Run when set up steps are skipped• Work on Staged programs while Current program runsProgram In/Out Mode Features• CAM program converter• Converter for prior-generation ProtoTRAK programs• DXF/DWG file converter (Optional)• Selection of file storage locations • Automatic file back-up routine• Preview graphics for unopened files • Networking• Create Master routine for combining programs• Transfer of Staged program to Current • Tool reconciliation for Master Programs • Parasolid file converter (optional)Control OptionsParasolid File Converter• Import and convert 3D CAD data into ProtoTRAK programs • ChainingDXF File Converter• Import and convert 2D CAD data into ProtoTRAK programs • DXF or DWG files • Chaining• Automatic Gap Closing • Layer control• Easy, prompted process that can be done at the machineCAM Out Converter• Save ProtoTRAK files as CAM files for running on different controls4th Axis OptionHardware and software that allows true 4th axis interpolation. Includes indexer, tailstock and fixture plate.DRO Mode Features• Incremental and absolute dimensions • Jog with selectable feed rates • Powerfeed X, Y or Z• Servo return to 0 absolute• Go To Dimensions from convenient reference• Spindle speed setting with manual override• Selectable handwheel resolution • Convenient choice of dimensional references:Machine Home, Part Zero, Abs Zero or Ball lock locationsProgram Mode Features• Auto Geometry Engine• Geometry-based programming • Tool Path programming • Scaling of print data • Multiple fixture offsets• Programming of Auxiliary Functions • Event Comments• Three-axis Geometry conversational programming• Incremental and absolute dimensions • Automatic diameter cutter comp • Circular interpolation • Linear interpolation• Look –graphics with a single button push • List step – graphics with programmed events displayed• Alphanumeric program names • Program data editing • Program pause• Conrad – automatic corner radius • Programmable spindle speeds • Math helps with graphical interface • Auto load of math solutions• Tool step over adjustable for pocket routines• Pocket bottom finish pass• Selectable ramp or plunge cutter entry • Subroutine repeat of programmed events • Nesting• Rotate about Z axis for skewing data • Copy• Copy rotate • Copy mirror• Tool data entry in event programming • Selectable retract in Bore operationsAuxiliary Functions• Coolant on/off • Air on/off• Pulse indexer (interface for a third party indexer)• Part change table positionCanned Cycles• Position • Drill• Bolt Hole • Mill • Arc• Circle pocket• Rectangular pocket • Irregular Pocket • Circular profile • Rectangular profile • Irregular Profile • Circle Island• Rectangular Island • Irregular Island • Helix• Thread milling • Engrave • Tapping • Face MillEdit Mode Features• Delete events • Erase program• Spreadsheet editing • Global data change • G-Code editor• Clipboard to copy events between programs• Move between subprograms in a master programProgram Set Up Mode Features• Verify Machining Simulation • Advanced tool library • Tool names• Tool length offset with modifiers• Tool path graphics with adjustable views • Program run time estimation clock • Convenient part/fixture management screen• Fixture offsets• Part offsets within fixture• Convenient manual tool handling when tools required exceed ATC capacity • Photo storage and display • Notes• Z Safety Dimension to prevent crashes • Tool Crib• Tool by Tool or Part by Part run strategy • Convenient Tool Reconciliation between programs and ATC• Convenient ATC capacity2615 Homestead Place Rancho Dominguez, CA 90220T | 310.608.44222615 Homestead Place Rancho Dominguez, CA 90220T | 310.608.4422© Copyright 2017, Southwestern Industries Inc., F16897。
Vi-RNN_算法储能电池在线SOC_估计
引用格式:文茹馨, 刘惠颖, 梁言贺, 等. Vi-RNN 算法储能电池在线SOC 估计[J]. 中国测试,2023, 49(5): 117-122. WEN Ruxin,LIU Huiying, LIANG Yanhe, et al. Online SOC estimation of energy storage lithium battery based on Vi-RNN algorithm[J]. China Measurement & Test, 2023, 49(5): 117-122. DOI: 10.11857/j.issn.1674-5124.2021100142Vi-RNN 算法储能电池在线SOC 估计文茹馨1, 刘惠颖1, 梁言贺1, 汪江昭2, 林文娟1, 王宗晶1, 李 琦1(1. 国网黑龙江省电力有限公司供电服务中心,黑龙江 哈尔滨 150070; 2. 湖南大学电气与信息工程学院,湖南 长沙 410082)摘 要: 锂离子电池的荷电状态(state of charge, SOC )估计是电池管理系统的重要组成部分。
更加精确的SOC 估计结果,有利于储能电站的并网和控制。
该文提出一种基于Vi-RNN 的储能电池SOC 估计算法,该算法将储能电池端口电压和电压增量作为输入,荷电状态作为输出,RNN 算法作为框架,实现在线更高精度的SOC 估计。
采用储能锂离子电池在0.2C 和0.3C 充放过程中的测量数据进行仿真分析。
结果显示:相较于MEA-BP 算法,该方法估计结果的均方误差和相对误差更低,均方误差降低约20%。
关键词: 锂电池; 荷电状态; 循环神经网络; 电压增量; 均方误差; 相对误差中图分类号: TM912文献标志码: A文章编号: 1674–5124(2023)05–0117–06Online SOC estimation of energy storage lithium battery based on Vi-RNN algorithmWEN Ruxin 1, LIU Huiying 1, LIANG Yanhe 1, WANG Jiangzhao 2, LIN Wenjuan 1, WANG Zongjing 1, LI Qi 1(1. State Grid Heilongjiang Power Supply Service Management Center, Harbin 150070 China; 2. College of Electricaland Information Engineering, Hunan University, Changsha 410082, China)Abstract : State of charge (SOC) estimation of lithium-ion battery is an important part of battery management system. More accurate SOC estimation results are conducive to the grid connection control of energy storage power station. In this paper, an energy storage battery SOC estimation algorithm based on Vi-RNN was proposed. The energy storage battery port voltage and voltage increment were taken as the input, and SOC estimation result was taken as the output, and the RNN neural network algorithm was used as the framework to realize the high-precision SOC estimation. In this paper, the measured data of energy storage lithium-ion battery during charging and discharging at 0.2C and 0.3C were used for simulation analysis. The results show that, compared with MEA-BP, the mean square error and relative error of our method are lower, and the mean square error is reduced by about 20%.Keywords : lithium battery; state of charge; recurrent neural network; voltage increment; mean square error;relative error0 引 言锂离子电池具有高比能量和高比功率[1],是储能领域中的研究热点。
sql server 2005 英文版
sql server 2005 英文版SQL Server 2005, released by Microsoft in 2005, marked a significant milestone in the evolution of database management systems. It introduced several innovative features and improvements that enhanced the performance, security, and scalability of enterprise-grade databases. This article delves into the core components and capabilities of SQL Server 2005, providing both a technical overview and a discussion on its impact on the industry.**1. Enhanced Performance and Scalability**SQL Server 2005 introduced several performance optimizations that made it more efficient and responsive. These included improvements in query processing, indexing, and data caching. Additionally, it supported online operations such as index creation and重建, minimizing downtime and enabling continuous database operations.The scalability of SQL Server 2005 was alsosignificantly improved with support for larger databases and more concurrent users. This made it a viable choice formission-critical applications that required highavailability and performance.**2. Enhanced Security Features**Security was a key focus in SQL Server 2005, with the introduction of several new features to protect data and prevent unauthorized access. These included stronger encryption algorithms, role-based access control, and enhanced auditing capabilities.With these new security features, organizations could ensure the integrity and confidentiality of their data while minimizing the risk of data breaches or unauthorized access.**3. Integration with Other Microsoft Technologies**SQL Server 2005 was tightly integrated with other Microsoft technologies, providing seamless integration with Windows Server, .NET Framework, and Office System. This integration allowed organizations to leverage theirexisting Microsoft investments and streamline operations across different platforms.**4. Advanced Analytics and Reporting**SQL Server 2005 included advanced analytics and reporting capabilities, making it a powerful tool for business intelligence and decision support. It supported data mining, online analytical processing (OLAP), and reporting services, enabling organizations to extract valuable insights from their data.**5. Simplified Management and Administration**SQL Server 2005 introduced several features to simplify database management and administration. These included an improved graphical user interface (GUI), enhanced scripting capabilities, and centralized management tools. These features made it easier for database administrators to monitor, maintain, and troubleshoot databases.**SQL Server 2005的影响与未来展望**SQL Server 2005的发布对数据库管理系统领域产生了深远的影响。
istio原理解析
istio原理解析Istio is an open-source service mesh platform that provides a way to control how microservices share data. It helps simplify microservices management and provides load balancing, service-to-service authentication, monitoring, and more. Istio is often used with Kubernetes to better manage and secure the communication between microservices.Istio uses an architecture that includes a data plane and a control plane. The data plane, which runs alongside the business logic of the application, is responsible for securely managing traffic between microservices. The control plane, on the other hand, manages and configures the data plane, ensuring that traffic policies are correctly enforced.One of the key features of Istio is circuit breaking, which can prevent a service from becoming overwhelmed by requests during a failure. By setting thresholds for the number of concurrent connections or failures, Istio can help automatically recover from overload situations.In addition, Istio also provides fault injection, allowing developers to test how services behave when things go wrong.Furthermore, Istio offers powerful routing and traffic management capabilities. It can route traffic based on HTTP headers, cookies, or other attributes, allowing for canary deployments, A/B testing, and gradual rollouts. This provides a way to validate new versions of services in production while minimizing the risk of failure.Another important aspect of Istio is security. It provides strong identity enforcement and access control for microservices, enabling policy-based access controls, secure communication, and encryption of traffic. Istio also integrates with existing identity management systems, like LDAP or Active Directory, simplifying the process of securing microservices.Finally, Istio provides robust observability features, including distributed tracing, metrics collection, and monitoring. These features help operators gain insights into the behavior and performance of microservices, providing visibility into how data flows through the system and identifying bottlenecks or issues.Istio的原理解析。
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Minimizing Concurrent Test Time in SoC’s by BalancingResource UsageDan ZhaoCSE DepartmentSUNY at BuffaloBuffalo,NY14260-2000 danzhao@Shambhu UpadhyayaCSE DepartmentSUNY at BuffaloBuffalo,NY14260-2000shambhu@Martin MargalaECE DepartmentUniversity of RochesterRochester,NY14627-0231margala@ABSTRACTWe present a novel test scheduling algorithm for embedded core-based SoC’s.Given a system integrated with a set of cores and a set of test resources,we select a test for each core from a set of alternative test sets,and schedule it in a way that evenly balances the resource usage,and ultimately reduce the test application time. Furthermore,we propose a novel approach that groups the cores and assign higher priority to those with smaller number of alternate test sets.In addition,we also extend the algorithm to allow multiple test sets selection from a set of alternatives to facilitate testing for various fault models.KeywordsSystem-on-a-chip test scheduling,resource balancing,test sets se-lection1.INTRODUCTIONThe system level integration is evolving as a new style of sys-tem design,where an entire system is built on a single chip using pre-designed,pre-verified complex logic blocks called embedded cores,which leverage the system by the intellectual property(IP) advantage.More specifically,the system designers(or integrators) may use the cores which cover a wide range of functions(e.g.,from CPU to SRAM to DSP to analog,etc.),and integrate them into a system on a single chip(SoC)with their own user-defined-logics (UDLs).The SoC technology has shown great advantage in short-ening the time-to-market of a new system and meeting various re-quirements(such as the performance,size and cost)of today’s elec-tronic products.However,testing such core-based SoC’s poses a major challenge for the system integrators,as they may have limited knowledge of the cores due to the so called IP protection,and on the other hand,various testing methods(e.g.,BIST,scan,functional,struc-ture,etc.)for many kinds of design environments are provided by different core vendors.In order to select an efficient test strategy for a SoC,several performance criteria listed below need to be con-sidered.Permission to make digital or hard copies of all or part of this work for personal or classroom use is granted without fee provided that copies are not made or distributed for profit or commercial advantage and that copies bear this notice and the full citation on thefirst page.To copy otherwise,to republish,to post on servers or to redistribute to lists,requires prior specific permission and/or a fee.GLSVLSI’02,April18-19,2002,New York,New York,USA. Copyright2002ACM1-58113-462-2/02/0004...$5.00.1)overall test time.The overall test time of a testing scheme is defined as the period from the start time of the test activity to the end time when the last test taskfinishes.Note that,only when all test sets in parallel test queuesfinish their tasks,we say it’s the end time of the test.In other words,the longest test queue dominates the overall test time.In addition,since the expensive testers are shared by many cores,the shorter the test time,the lower the cost is.The test time may be reduced by using shorter test vectors or better scheduling schemes.2)fault coverage.In order to gain a high fault coverage,the in-dividual embedded cores and UDLs should be tested thoroughly, which is also referred as core-level testing.This includes consid-eration of various fault models.In addition,the interconnections between different system blocks also need to be tested.Finally the system level testing should be processed to check the system func-tions.3)area overhead.The area overhead is the extra silicon area needed in order to perform the SoC test.The area overhead should be limited within a certain area budget,and kept as small as possi-ble.4)performance overhead.As one undesirable side-effect of in-tegrating test resources into the system,the power consumption of the SoC may increase while its speed may decrease.This perfor-mance overhead may vary when using different testing methods, and thus becomes a major performance criterion when evaluating various test strategies.In this paper,we address the test scheduling problem for em-bedded core-based SoC’s.We consider a system where one test set needs to be selected for each core from a group of test sets using various test resources,and propose a novel test scheduling scheme to reduce the overall test time.The basic idea of the pro-posed scheduling algorithm is to efficiently balance the resource usage.The rest of this paper is organized as follows.In Sec.2,we dis-cuss the conflicts and constraints for the scheduling problem and the existing scheduling schemes.Sec.3describes a general SoC model,in which each core may have multiple test sets using differ-ent resources.In Sec.4,we propose a novel scheduling algorithm based on the effective balancing of resource usage.Sec.5extends the algorithm by selecting multiple test sets for each core.Finally, Sec.6concludes the paper and presents the future works.2.RELATED WORKThe objective of test scheduling is to decide the start and end times for the test of each core in order to meet all of the constraints and avoid any conflicts of test application.The basic idea is to schedule the tests in parallel so that those nonconflicting tests canbe executed concurrently,and thus the total testing time may be reduced.cores),mixed-signal cores(denoted as M cores or A cores andDcores only.Without loss of generality,we assume that a SoC includes n cores,and there are m resources available for testing.A core may need one or several tests to meet the required fault coverage.Each test set includes a set of test vectors and needs one resource,which can be used by one core at one time.There are different test sets to achieve the same fault coverage but with different test time byr1 - r8 are different testing resourcesD1 - D3 are digital coresA1 - A2 are analog coresM is a mixed-signal coreB is denoted as different functional blocks in a coreiFigure1:A General SoC Model.r6r7r8A1A2MD3UDLD2D1r1r2r3r4r5Figure2:Graph Representation of Resource Sharing.using different resources.In other words,a core vendor may have provided a set of alternative tests,and one test from each group needs to be performed to achieve the required fault coverage.A collision occurs when the tests sharing the same resource or the tests for the same core are performed in parallel.In addition,the total power consumption must not exceed the maximum power al-lowance at any time1.Given the test time and the required fault coverage,the goal of the scheduling technique is to efficiently determine the start time of the test sets to minimize the total test application time.More formally,we define the SoC model as TM=C,RSC,T, FC,in which C c1c2c n is afinite set of cores,RSC r1r2r m is afinite set of resources,FC is the fault coverage required to test each core,and T=T11,T12,...,T1m,...,T n1,T n2,..., T nm is afinite set of tests,which are shown in a n m matrix in Figure3.In the matrix,each test set,defined as T i j t i j(where t i j is the test time),consists of a set of test vectors.Test set T i j represents a test set for testing core c i by using resource r j.The entries with zero indicate that such test sets are not available.4.A NOVEL TEST SCHEDULING ALGO-RITHM:RESOURCE BALANCINGAs the test scheduling problem is NP-complete,many heuristic algorithms have been proposed.However,as we have discussed in Sec.2,most of them assume that all of the given test sets have to be used in testing.In this work,we propose an efficient heuristic.................................................................r2r1r3rm c1c2c3c4cnT1100000T310T12T22T2m T430Tn1Tn2Tn3Tnm000for testing core c by using resource r .Each vector T in the matrix represents a test set T i jijij Figure 3:Matrix Representation of Test Sets.list of parallel queue.....usage of r1usage of r2usage of r3usage of rm .....T11t11T12t12Tnm tnmtest set T for core c ij iFigure 4:Parallel Usage of Test Resources.scheduling algorithm for the case where one of a group of test setsmay be selected for each core to perform testing,and take into con-sideration the test conflicts and the fault coverage requirements.A generalization of this problem is given in Sec.5.We consider a system discussed in Sec.3and define m queues in parallel corresponding to m resources that may be used at the same time independently (see Figure 4).The length of the queue denotes the total testing time of all test sets using the resource.We assume that there are P i (1P i m )test sets,which use different resources,available for testing core c i ,and one core needs only one of these test sets to achieve the required fault coverage (However,this limit will be nullified later for the multiple test sets case.).In order to schedule the test sets for such a system,we propose a resource-balancing heuristic algorithm.The basic idea of this algorithm is to use the resources as evenly as possible,because the total testing time is dominated by the longest usage time among all resources used in a test.When scheduling core c i ,we temporarily insert all of its test sets into the corre-sponding queues.Then we choose the one resulting in shortest queue length,and delete other test sets of c i from the other queues.For example,we execute the algorithm (refer to the pseudocode in Figure 5)for a core-based system with 6cores and 4resources as shown in Table 1,which shows the test time for each test set using a resource for each core.We first sequentially select the shortest test among their alternatives for cores c 0,c 1,c 2and insert them into r 3,r 2,r 0respectively.Note that,a shorter test set will not always be selected as it may use the resource corresponding to a longer queue.For example,when we schedule c 3,we may not select the one (T 33)with shortest test time (9)since it results in a longer queue length (for r 3).Instead,we select T 32and insert it into queue r 2.Similarlyj i /* for all test sets t of c */i/* Balancing resource usage queues without grouping*/begin CORE :r[P]it[P]for i := 1 to n dofor i := 1 to m do short_length = CORE[i].t[j] + rqs[CORE[i].r[j]]_length;short_length_id =j;endbeginend/* update the queue length */rqs[j]_length = short_length;Insert test(short_length_id) into rqs[CORE[i].r[short_length_id]];/* get the shortest queue length */for j := 2 to CORE[i].P do if (CORE[i].t[j] + rqs[CORE[i].r[j]]_length < short_length) thenshort_length_id = 1;short_length=CORE[i].t[1]+rqs[CORE[i].r[1]]_length;/* n is the number of cores *//* m is the number of resources */Read the data into the structure CORE, including the following members,/* core id */P/* the number of test sets *//* the test time of each test set *//* the corresponding test resource *//* initialize the resource usage queues, rqs[i] is the queue of r */i rqs[i] = ;Figure 5:The Scheduling Algo.Without Grouping.Table 1:The Matrix of Test Sets for An Example SystemT i j r 1r 3c 076c 140c 2012c 309c 472c 500c 660r0r1r2r3r0r1r2r3Figure 6:The Resource Balancing Approach.lower P value will be scheduled earlier,because these tests have to be put into certain queues (i.e.,the corresponding cores have to be tested by using certain resources.).Next,we may choose proper test sets from the group with larger P value to balance the lengths of the queues.The pseudocode of this algorithm is shown in Figure 7./* Balancing resource usage queues with grouping */begin CORE :t[P]Pfor i := 1 to n doCORE[i] --> G[CORE[i].P];/* group the cores */for each groupshort_length=CORE[i].t[1]+rqs[CORE[i].r[1]]_length;short_length_id = 1;for j := 2 to CORE[i].P doif (CORE[i].t[j] + rqs[CORE[i].r[j]]_length < short_length) then beginshort_length = CORE[i].t[j] + rqs[CORE[i].r[j]]_length;short_length_id =j;endInsert test(short_length_id) into rqs[CORE[i].r[short_length_id]];rqs[j]_length = short_length;endRead the data into the structure CORE, including the following members,for each core i in the groupi /* core id *//* the number of test sets *//* the test time of each test set */r[P]/* the corresponding test resource */for i := 1 to m do /* m is the number of resources *//* n is the number of cores */rqs[i] = ;/* initialize the resource usage queues, rqs[i] is the queue of r */i Figure 7:The Scheduling Algo.With Grouping.Figure 6(2)illustrates the execution of the algorithm with group-ing (refer to Figure 7)for the example system.By grouping,c 1,c 3,c 5and c 6are in the same group and are inserted into queue r 2,r 3,r 2and r 0respectively.Then we schedule c 0and c 2.Note that,we will select the test with test time of 7for core c 0and insert it into r 1,although there are other test sets with shorter test times.Similarly we insert the test set with time of 3for c 2into r 0,and finally insert the test set with time of 6for c 4into r 2.The total test time is pared to the case (Figure 6(1))where we don’t use groping,the total test time is reduced by 5.As we can see,group-ing the cores before scheduling can significantly reduce the total testing time and achieve better balancing of resource usage,while the worst case time complexity remains the paring the schedule with and without grouping (see Figures 6,8and 9),we get the following conclusion.Result 1.Grouping always helps balance the resource usage queue lengths.Figure 8:G Changing With the Number of Cores.We evaluate the proposed scheduling algorithms via simulations.In our simulation model,we use randomly generated test sets.We define the balance ratio as G,which can be expressed by the fol-lowing equation,GL wgL wogMaximum number of resources for each coreG (%)Figure 9:G Changing With the Max.Number of Resources for Each Core.Figure 10:The Worst Case Scheduling.5.MULTIPLE TEST SETS SELECTION &SCHEDULINGIn the last section,we assumed that one core needs only one test set.More generally,a core may need multiple (say L)test sets to achieve a certain fault coverage.For example,in a embedded-core-based SoC,several test methods are used to test embedded memory.As we all know,in addition to stuck-at,bridging,and open faults,memory faults include bit-pattern,transition,and cell-coupling faults.Parametric,timing faults,and sometimes,transis-tor stuck-on/off faults,address decoder faults,and sense-amp faults are also considered.[7]has listed various test methods for embed-ded memory,i.e.,Direct access,Local boundry scan or wrapper,BIST,ASIC functional test,Through on-chip microprocessor,etc..Different test method may require different test resource,use dif-ferent test time,and provide different fault coverage.In this case,we can simply make L virtual cores and convert the 1-L mapping to a 1-1mapping.The only difference between this and the single test selection we discussed earlier is that,when choosing the short-est queue,one has to check if the selected test set conflicts with others which are for the same core and overlap the running time.Figure 12illustrates the multiple test sets scheduling for a system shown in Figure 11,which can be performed in two steps.First,we create L virtual cores for each core corresponding to L fault models.For each fault model,a group of test sets with various test time is provided for the required fault coverage.This means,each virtual core has a group of test sets available and we select one of them to perform testing.Thus we map the multiple tests selection model to the single test selection case.We select the tests in a way that we balance the queues in order to avoid thef00c0f01f10t10 = 3t11 = 8t12 = 12r0r3t13 = 13t00 = 12t01 = 7t02 = 6r0r1r3t03 = 4r1t04 = 1r2r2r2r3f11f12t18 = 11r0r1r2r3c1t20 = 5t21 = 1r0r2c2f20c3f30t30 = 4t31 = 6r0r1t32 = 18t33 = 11t34 = 9r1r3r2f31Core ID Fault model Test set selection group Corresponding resourcet16 = 3t17 = 6t15 = 5t14 = 8Figure 11:A Fault Model Based System.situation that all the test sets will only use some of the resources and thus result in long length in these queues.In the second step,we need to reschedule the tests for thesame core which overlap the running time.The shortest-task-first procedure will be adopted here for rescheduling.The worst case complexity is O (r 3),where r is the number of the virtual cores.(b) rescheduling to avoid conflicting(a) test set selection for each fault model of coresFigure 12:Multiple Test Sets Scheduling.6.CONCLUSION AND FUTURE WORKIn this paper,we have presented an efficient test scheduling al-gorithm for embedded core-based SoC’s.With the flexibility of selecting a test set from a set of alternatives,we have proposed to schedule the tests for a given system in a way that balances the resource usage queue as evenly as possible,thus reducing the over-all test time.Furthermore,we have presented a grouping schemeto optimize the schedule and evaluated the approaches via simula-tion.Our simulations showed that there is no explicit dead time in our approach and we can further reduce the implicit dead time by proper grouping.We have also extended the algorithm to allow multiple test sets selection from a set of fault model based alterna-tives.Our initial results lead to further study in the following research directions.We will develop efficient test scheduling algorithm to reflect the various constraints,not only resource sharing and fault coverage,but also power dissipation.Experiments with benchmarks will be performed for perfor-mance verification of the proposed scheduling algorithms.We will extend our work to mixed-signal SoC’s.We will discuss the modelling of mixed-signal SOC for developing testability analysis,scheduling and diagnosis and present ef-ficient test scheduling algorithms to minimize the test cost.7.REFERENCES[1]K.Chakrabarty,“Test scheduling for core-based systemsusing mixed-integer linear programming,”IEEE Trans.onComputer-Aided Design of Integrated Circuits and Systems,vol.19,pp.1163–1174,October2000.[2]rsson and Z.Peng,“System-on-chip test parallelizationunder power constraints,”in Proc.of IEEE European TestWorkshop,May2001.[3]M.Sugihara,H.Data,and H.Yasuura,“Analysis andminimization of test time in a combined BIST and externaltest approach,”in Design,Automation and Test in EuropeConference2000,pp.134–140,March2000.[4]R.Chou,K.Saluja,and V.Agrawal,“Scheduling tests forVLSI systems under power constraints,”IEEE Trans.on VLSI Systems,vol.5,pp.175–185,June1997.[5]V.Muresan,X.Wang,V.Muresan,and M.Vladutiu,“Acomparison of classical scheduling approaches inpower-constrained block-test scheduling,”in ProceedingsIEEE International 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