The performance tradeoff between hardware complexity and clock speed is studied. First, a generic superscalar pipeline is defined. Then the specific areas of register renaming, instruction window wakeup and selection logic, and operand bypassing are analyzed. Each is modeled and Spice simulated for feature sizes of 0:8 m, 0:35 m, and0:18 m. Performance results and trends are expressed in terms of issue width and window size. Our analysis indicates that window wakeup and selection logic as well as operand bypass logic are likely to be the most critical in the future. A microarchitecture that simplifies wakeup and selection logic is proposed and discussed. This implementation puts chains of dependent instructions into queues, and issues instructions from multiple queues in parallel. Simulation shows little slowdown as compared with a completely flexible issue window when performance is measured in clock cycles. Furthermore, because only instructions at queue heads need to be awakened and selected, issue logic is simplified and the clock cycle is faster – consequently overall performance is improved. By grouping dependent instructions together, the proposed microarchitecture will help minimize performance degradation due to slow bypasses in future wide-issue machines. 1

Instruction-level Parallelism CILP) is a family of processor and compiler design techniques that speed up execution by causing individual machine operations to execute in parallel. Although ILP has appeared in the highest performance uniprocessors for the past 30 years, the 1980s saw it become a much more significant force in computer design. Several systems were built, and sold commercially, which pushed ILP far beyond where it had been before, both in terms of the amount of ILP offered and in the central role ILP played in the design of the system. By the end of the decade, advanced microprocessor design at all major CPU manufacturers had incorporated ILP, and new techniques for ILP have become a popular topic at academic conferences. This article provides an overview and historical perspective of the field of ILP and its development over the past three decades.

Over the last decade, the Petri net has gamed increased usage and acceptance as a basic model of systems of asynchronous concurrent computation. This paper surveys the basic concepts and uses of Petm nets. The structure of Petri nets, their markings and execution, several examples of Petm net models of computer hardware and software, and

Superscalar processing is the latest in a long series of innovations aimed at producing ever-faster microprocessors. By exploiting instruction-level parallelism, superscalar processors are capable of executing more than one instruction in a clock cycle. This paper discusses the microarchitecture of superscalar processors. We begin with a discussion of the general problem solved by superscalar processors: converting an ostensibly sequential program into a more parallel one. The principles underlying this process, and the constraints that must be met, are discussed. The paper then provides a description of the specific implementation techniques used in the important phases of superscalar processing. The major phases include: i) instruction fetching and conditional branch processing, ii) the determination of data dependences involving register values, iii) the initiation, or issuing, of instructions for parallel execution, iv) the communication of data values through memory via loads and stores, and v) committing the process state in correct order so that precise interrupts can be supported. Examples of recent superscalar microprocessors, the MIPS R10000, the DEC 21164, and the AMD K5 are used to illustrate a variety of superscalar methods.

Register renaming and out-of-order instruction issue are now commonly used in superscalar processors. These techniques can also be used to significant advantage in vector processors, as this paper shows. Performance is improved and available memory bandwidth is used more effectively. Using a trace driven simulation we compare a conventional vector implementation, based on the Convex C3400, with an out-of-order, register renaming, vector implementation. When the number of physical registers is above 12, out-of-order execution coupled with register renaming provides a speedup of 1.24--1.72 for realistic memory latencies. Out-of-order techniques also tolerate main memory latencies of 100 cycles with a performance degradation less than 6%. The mechanisms used for register renaming and out-of-order issue can be used to support precise interrupts -- generally a difficult problem in vector machines. When precise interrupts are implemented, there is typically less than a 10% degradation in performance. A new technique based on register renaming is targeted at dynamically eliminating spill code; this technique is shown to provide an extra speedup ranging between 1.10 and 1.20 while reducing total memory traffic by an average of 15--20%.

High-performance, general-purpose microprocessors serve as compute engines for computers ranging from personal computers to supercomputers. Sequential programs constitute a major portion of real-world software that run on the computers. State-of-the-art microprocessors exploit instruction level parallelism (ILP) to achieve high performance on such applications by searching for independent instructions in a dynamic window of instructions and executing them on a wide-issue pipeline. Increasing the window size and the issue width to extract more ILP may hinder achieving high clock speeds, limiting overall performance. The Multiscalar architecture employs multiple small windows and many narrow-issue processing units to exploit ILP at high clock speeds. Sequential programs are partitioned into code fragments called tasks, which are speculatively executed in parallel. Inter-task register dependences are honored via communication and synchronization and inter-task control flow and memory depe...

VLIW processors are viewed as an attractive way of achieving instruction-level parallelism because of their ability to issue multiple operations per cycle with relatively simple control logic. They are also perceived as being of limited interest as products because of the problem of object code compatibility across processors having different hardware latencies and varying levels of parallelism. In this paper, we introduce the concept of delayed split-issue and the dynamic scheduling hardware which, together, solve the compatibility problem for VLIW processors and, in fact, make it possible for such processors to use all of the interlocking and scoreboarding techniques that are known for superscalar processors.

VLIW architecture, instruction-level parallelism, MultiOp, nonunit assumed latencies, NUAL, rotating register files, unbundled branches, control speculation, speculative opcodes, exception tag, predicated execution, fully-resolved predicates, wired-OR and wired-AND compare opcodes, prioritized loads and stores, data speculation, cache specifiers, precise interrupts, NUAL-freeze and NUALdrain semantics, delay buffers, replay buffers, EQ and LEQ semantics, latency stalling, MultiOp-P and MultiOp-S semantics, dynamic translation,

Predicated execution has been used to reduce the number of branch mispredictions by eliminating hard-to-predict branches. However, the additional instruction overhead and additional data dependencies due to predicated execution sometimes offset the performance advantage of having fewer mispredictions. We propose a mechanism in which the compiler generates code that can be executed either as predicated code or non-predicated code (i.e., code with normal conditional branches). The hardware decides whether the predicated code or the non-predicated code is executed based on a run-time confidence estimation of the branch’s prediction. The code generated by the compiler is the same as predicated code, except the predicated conditional branches are NOT removed—they are left intact in the program code. These conditional branches are called wish branches. The goal of wish branches is to use predicated execution for hard-to-predict dynamic branches and branch prediction for easy-to-predict dynamic branches, thereby obtaining the best of both worlds. We also introduce a class of wish branches, called wish loops, which utilize predication to reduce the misprediction penalty for hard-to-predict backward (loop) branches. We describe the semantics, types, and operation of wish branches along with the software and hardware support required to generate and utilize them. Our results show that wish branches decrease the average execution time of a subset of SPEC INT 2000 benchmarks by 14.2 % compared to traditional conditional branches and by 13.3% compared to the best-performing predicated code binary. 1.

A thread executing on a simultaneous multithreading (SMT) processor that experiences a long-latency load will eventually stall while holding execution resources. Existing long-latency load aware SMT fetch policies limit the amount of resources allocated by a stalled thread by identifying long-latency loads and preventing the given thread from fetching more instructions — and in some implementations, instructions beyond the long-latency load may even be flushed which frees allocated resources. This paper proposes an SMT fetch policy that takes into account the available memory-level parallelism (MLP) in a thread. The key idea proposed in this paper is that in case of an isolated long-latency load, i.e., there is no MLP, the thread should be prevented from allocating additional resources. However, in case multiple independent long-latency loads overlap, i.e., there is MLP, the thread should allocate as many resources as needed in order to fully expose the available MLP. The proposed MLP-aware fetch policy achieves better performance for MLP-intensive threads on an SMT processor and achieves a better overall balance between performance and fairness than previously proposed fetch policies. 1