Apparatus and method for a software pipeline loop procedure in a digital signal processor

RELATED APPLICATION

[0001] This application claims priority from provisional patent application No. 60/342,706 entitled APPARATUS AND METHOD FOR A SOFTWARE PIPELINE LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Eric J. Stotzer, Steve D. Krueger, and Timothy D. Anderson, filed on Dec. 20, 2001, and assigned to the assignee of the present Application: and provisional patent application No. 60/342,728 entitled APPARATUS AND METHOD FOR IMPROVED EXECUTION OF A SOFTWARE PIPELINE LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Timothy D. Anderson, Michael D. Asal, and Eric J. Stotzer, filed on Dec. 20, 2001, and assigned to the assignee of the present Application:

[0002] U.S. patent application Ser. No. 09/855,140 (Attorney Docket TI-25737) entitled LOOP CACHE MEMORY AND CACHE CONTROLLER FOR PIPELINED MICROPROCESSORS, invented by Richard H. Scales, filed on May 14, 2001, and assigned to the assignee of the present Application: U.S. Patent Application (Attorney Docket TI-33896), entitled APPARATUS AND METHOD FOR IMPROVED EXECUTION OF A SOFTWARE PIPELINE LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Timothy D. Anderson, Michael D. Asal, and Eric J. Stotzer, filed on even date herewith, and assigned to the assignee of the present Application: U.S. Patent Application (Attorney Docket TI-34336), entitled APPARATUS AND METHOD FOR PROCESSING AN INTERRUPT IN A SOFTWARE PIPELINE LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Eric J. Stotzer, Steve D. Krueger, Timothy D. Anderson, and Michael D. Asal, filed on even date herewith, and assigned to the assignee of the present Application: U.S. Patent (Attorney Docket TI-34337), entitled APPARATUS AND METHOD FOR EXECUTING A NESTED LOOP PROGRAM WITH A SOFTWARE PIPELINE LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Eric J. Stotzer and Michael D. Asal, filed on even date herewith, and assigned to the assignee of the present Application; and U.S. Patent Application (Attorney Docket TI-34565), entitled APPARATUS AND METHOD FOR RESOLVOING AN INSTRUCTION CONFLICT IN A SOFTWARE PIPELINE NESTED LOOP PROCEDURE IN A DIGITAL SIGNAL PROCESSOR, invented by Eric J. Stotzer and Michael D. Asal, filed on even date herewith, and assigned to the assignee of the present application are related applications.

BACKGROUND OF THE INVENTION

[0003] 1. Field of the Invention

[0004] This invention relates generally to the execution of instructions in a digital signal processor, and more particularly to the execution of instructions in a software pipeline loop.

[0005] 2. Background of the Invention

[0006] A microprocessor is a circuit that combines the instruction-handling, arithmetic, and logical operations of a computer on a single chip. A digital signal processor (DSP) is a microprocessor optimized to handle large volumes of data efficiently. Such processors are central to the operation of many of today's electronic products, such as high-speed modems, high-density disk drives, digital cellular phones, and complex automotive systems, and will enable a wide variety of other digital systems in the future. The demands placed upon DSPs in these environments continue to grow as consumers seek increased performance from their digital products.

[0007] Designers have succeeded in increasing the performance of DSPs generally by increasing clock frequencies, by removing architectural bottlenecks in DSP circuit design, by incorporating multiple execution units on a single processor circuit, and by developing optimizing compilers that schedule operations to be executed by the processor in an efficient manner. As further increases in clock frequency become more difficult to achieve, designers have implemented the multiple execution unit processor as a means of achieving enhanced DSP performance. For example, FIG. 1 shows a block diagram of a DSP execution unit and register structure having eight execution units, L1, S1, M1, D1, L2, S2, M2, and D2. These execution units operate in parallel to perform multiple operations, such as addition, multiplication, addressing, logic functions, and data storage and retrieval, simultaneously.

[0008] The Texas Instruments TMS320C6x (C6x) processor family comprises several embodiments of a processor that may be modified advantageously to incorporate the present invention. The C6x family includes both scalar and floating-point architectures. The CPU core of these processors contains eight execution units, each of which requires a 31-bit instruction. If all eight execution units of a processor are issued an instruction for a given clock cycle, the maximum instruction word length of 256 bits (8 31-bit instructions plus 8 bits indicating parallel sequencing) is required.

[0009] A block diagram of a C6x processor connected to several external data systems is shown in FIG. 1. Processor 10 comprises a CPU core 20 in communication with program memory controller 30 and data memory controller 12. Other significant blocks of the processor include peripherals 14, a peripheral bus controller 17, and a DMA controller 18.

[0010] Processor 10 is configured such that CPU core 20 need not be concerned with whether data and instructions requested from memory controllers 12 and 30 actually reside on-chip or off-chip. If requested data resides on chip, controller 12 or 30 will retrieve the data from respective on-chip data memory 13 or program memory/cache 31. If the requested data does not reside on-chip, these units request the data from external memory interface (EMIF) 16. EMIF 16 communicates with external data bus 70, which may be connected to external data storage units such as a disk 71, ROM 72, or RAM 73. External data bus 70 is 32 bits wide.

[0011] CPU core 20 includes two generally similar data paths 24a and 24b, as shown in FIG. 1 and detailed in FIGS. 2a and 2b. The first path includes a shared multiport register file A and four execution units, including an arithmetic and load/store unit D1, an arithmetic and shifter unit S1, a multiplier M1, and an arithmetic unit L1. The second path includes multiport register file B and execution units arithmetic unit L2, shifter unit S2, multiplier M2, and load/store unit D2. Capability (although limited) exists for sharing data across these two data paths.

[0012] Because CPU core 20 contains eight execution units, instruction handling is an important function of CPU core 20. Groups of instructions, 256 bits wide, are requested by program fetch 21 and received from program memory controller 30 as fetch packets, i.e. 100, 200, 300, 400, where each fetch packet is 32 bits wide. Instruction dispatch 22 distributes instructions from fetch packets among the execution units as execute packets, forwarding the “ADD” instruction to the arithmetic unit, L1 or the arithmetic unit L2, the “MPY” instruction to either Multiplier unit M1 or M2, the “ADDK” instruction to either arithmetic and shifter units S1 or S2 and the “STW” instruction to either arithmetic and load/store units, D1 and D2. Subsequent to instruction dispatch 22, instruction decode 23 decodes the instructions, prior to application to the respective execute unit.

[0013] Theoretically, the performance of a multiple execution unit processor is proportional to the number of execution units available. However, utilization of this performance advantage depends on the efficient scheduling of operations such that most of the execution units have a task to perform each clock cycle. Efficient scheduling is particularly important for looped instructions, since in a typical runtime application the processor will spend the majority of its time in loop execution.

[0014] Traditionally, the compiler is the piece of software that performs the scheduling operations. The compiler is the piece of software that translates source code, such as C, BASIC, or FORTRAN, into a binary image that actually runs on a machine. Typically the compiler consists of multiple distinct phases. One phase is referred to as the front end, and is responsible for checking the syntactic correctness of the source code. If the compiler is a C compiler, it is necessary to make sure that the code is legal C code. There is also a code generation phase, and the interface between the front-end and the code generator is a high level intermediate representation. The high level intermediate representation is a more refined series of instructions that need to be carried out. For instance, a loop might be coded at the source level as: for (I=0,I<10,I=I+1), which might in fact be broken down into a series of steps, e.g. each time through the loop, first load up I and check it against 10 to decide whether to execute the next iteration.

[0015] A code generator of the code generator phase takes this high level intermediate representation and transforms it into a low level intermediate representation. This is closer to the actual instructions that the computer understands. An optimizer component of a compiler must preserve the program semantics (i.e. the meaning of the instructions that are translated from source code to an high level intermediate representation, and thence to a low level intermediate representation and ultimately an executable file), but rewrites or transforms the code in a way that allows the computer to execute an equivalent set of instructions in less time.

[0016] Source programs translated into machine code by compilers consists of loops, e.g. DO loops, FOR loops, and WHILE loops. Optimizing the compilation of such loops can have a major effect on the run time performance of the program generated by the compiler. In some cases, a significant amount of time is spent doing such bookkeeping functions as loop iteration and branching, as opposed to the computations that are performed within the loop itself. These loops often implement scientific applications that manipulate large arrays and data instructions, and run on high speed processors. This is particularly true on modern processors, such as RISC architecture machines. The design of these processors is such that in general the arithmetic operations operate a lot faster than memory fetch operations. This mismatch between processor and memory speed is a very significant factor in limiting the performance of microprocessors. Also, branch instructions, both conditional and unconditional, have an increasing effect on the performance of programs. This is because most modem architectures are super-pipelined and have some sort of a branch prediction algorithm implemented. The aggressive pipelining makes the branch misprediction penalty very high. Arithmetic instructions are interregister instructions that can execute quickly, while the branch instructions, because of mispredictions, and memory instructions such as loads and stores, because of slower memory speeds, can take a longer time to execute.

[0017] One effective way in which looped instructions can be arranged to take advantage of multiple execution units is with a software pipelined loop. In a conventional scalar loop, all instructions execute for a single iteration before any instructions execute for following iterations. In a software pipelined loop, the order of operations is rescheduled such that one or more iterations of the original loop begin execution before the preceding iteration has finished. Referring to FIG. 5, a simple scalar loop containing 20 iterations of the loop of instructions A, B, C, D and E is shown. FIG. 6 depicts an alternative execution schedule for the loop of FIG. 5, where a new iteration of the original loop is begun each clock cycle. For clock cycles I4-I19, the same instruction (An,Bn−1,Cn−2,Dn−3,En−4) is executed each clock cycle in this schedule. If multiple execution units are available to execute these operations in parallel, the code can be restructured to perform this repeated instruction in a loop. The repeating pattern of A,B,C,D,E (along with loop control operations) thus forms the loop kernel of a new, software pipelined loop that executes the instructions at clock cycles I4-I19 in 16 loops. The instructions executed at clock cycles I1 through I3 of FIG. 8 must still be executed first in order to properly “fill” the software pipelined loop; these instructions are referred to as the loop prolog. Likewise, the instructions executed at clock cycles I20 and I23 of FIG. 2 must still be executed in order to properly “drain” the software pipeline; these instructions are referred to as the loop epilog (note that in many situations the loop epilog may be deleted through a technique known as speculative execution).

[0018] The simple example of FIGS. 5 and 6 illustrates the basic principles of software pipelining, but other considerations such as dependencies and conflicts may constrain a particular scheduling solution. For an explanation of software pipelining in more detail, see Vicki H. Allan, Software Pipelining, 27 ACM Computing Surveys 367 (1995). An example of software pipeline techniques is given in U.S. Pat. No. 6,178,499 B1, entitled INTERRUPTABLE MULTIPLE EXECUTION UNIT PROCESSING DURING OPERATIONS UTILIZING MULTIPLE ASSIGNMENT OF REGISTERS, issued Jan. 23, 2001, invented by Stotzer et al. and assigned to the assignee of the present application.

[0019] One disadvantage of software pipelining is the need for a specialized loop prolog for each loop. The loop prolog explicitly sequences the initiation of the first several iterations of a pipeline, until the steady-state loop kernel can be entered (this is commonly called “filling” the pipeline). Steady-state operation is achieved only after every instruction in the loop kernel will have valid operands if the kernel is executed. As a rule of thumb, the loop kernel can be executed in steady state after k=l−m clock cycles, where l represents the number of clock cycles required to complete one iteration of the pipelined loop, and m represents the number of clock cycles contained in one iteration of the loop kernel (this formula must generally be modified if the kernel is unrolled).

[0020] Given this relationship, it can be appreciated that as the cumulative pipeline delay required by a single iteration of a pipelined loop increases, corresponding increases in loop prolog length are usually observed. In some cases, the loop prolog code required to fill the pipeline may be several times the size of the loop kernel code. As code size can be a determining factor in execution speed (shorter programs can generally use on-chip program memory to a greater extent than longer programs), long loop prologs can be detrimental to program execution speed. An additional disadvantage of longer code is increased power consumption—memory fetching generally requires far more power than CPU core operation.

[0021] One solution to the problem of long loop prologs is to “prime” the loop. That is, to remove the prolog and execute the loop more times. To do this, certain instructions such as stores, should not execute the first few times the loop is executed, but instead execute the last time the loop is executed. This could be accomplished by making those instructions conditional and allocating a new counter for every group of instructions that should begin executing on each particular loop iteration. This, however, adds instructions for the decrement of each new loop counter, which could cause lower loop performance. It also adds code size and extra register pressure on both general purpose registers and conditional registers. Because of these problems, priming a software pipelined loop is not always possible or desirable.

[0022] In addition, after the kernel has been executed, the need arises for efficient execution of the epilog of the software pipeline, a procedure referred to as “draining” the pipeline.

[0023] A need has therefore been felt for apparatus and an associated method having the feature that the code size, power consumption, and processing delays are reduced in the execution of a software pipeline procedure. It is a further feature of the present invention to provide a plurality of instruction stages for the software pipelined program, the instruction stages each including at least one instruction, wherein all of the stages can be executed simultaneously without conflict. It is a more particular feature of the present invention to provide a program memory controller that can execute the prolog, kernel, and epilog of the software pipeline program. It is further particular feature of the present invention to execute a prolog procedure, a kernel procedure, and an epilog procedure for a sequence of instructions in response to an instruction. It is yet another feature of the present invention to provide for an early exit of the pipeline software procedure in response to a predetermined condition. It is a still further feature of the present invention to begin execution of a second software pipeline procedure prior to completion of a first software pipeline procedure.

SUMMARY OF THE INVENTION

[0024] The aforementioned and other features are accomplished, according to the present invention, by providing a program memory controller unit of a digital signal processor with apparatus for executing a sequence of instructions as a software pipeline loop procedure in response to an instruction. The instruction includes the parameters needed to implement the software pipeline procedure without additional software intervention. The apparatus includes a dispatch buffer unit for the storage of a plurality of instruction stages. Each instruction stage can include one or more execution packets. Each execution packet can include one or more instructions. During the prolog portion of the software pipeline loop procedure, each instruction stages is retrieved from the program/cache memory unit and is simultaneously applied to the dispatch crossbar unit for execution and is stored in the dispatch buffer unit. As the currently retrieved instruction stage is retrieved from memory for execution and storage, the previously stored instruction stages in the dispatch buffer unit are applied to the dispatch crossbar unit for execution. When all of the instruction stages of the program have been retrieved and stored in the dispatch buffer unit, then the program memory controller unit causes all of the instruction stages stored in the dispatch buffer unit to be applied simultaneously in parallel to the dispatch crossbar unit for executions. All of the instruction stages stored in the dispatch buffer is called the kernel and the simultaneous execution for the kernel instructions is called the kernel procedure of the software pipeline loop procedure. When the total number of executions of the first instruction stage has been executed a predetermined number of times equal to the number of iterations required by the program, then the program controller unit implements the epilog procedure and drains the instruction stages from the dispatch buffer unit as each instruction stage is executed the predetermined number of times.

[0025] Other features and advantages of present invention will be more clearly understood upon reading of the following description and the accompanying drawings and the claims.

BRIEF DESCRIPTION OF THE DRAWINGS

[0026]
FIG. 1 is a block diagram depicting the execution units and registers of a multiple-execution unit processor, such as the Texas Instruments C6x microprocessor on which a preferred embodiment of the current invention is operable to execute.

[0027]

FIG. 2

a
illustrates in a more detailed block diagram form, the flow of fetch packets as received from program memory 30 through the stages of fetch 21, dispatch 22, decode 23, and the two data paths 1 and 2, 24a and 24b; while FIG. 2b illustrates in detail the data paths 1, 24a, and 2, 24b of FIGS. 1 and 2.

[0028]
FIG. 3 illustrates the C6000 pipeline stages on which the current invention is manifested as an illustration.

[0029]
FIG. 4 illustrates the Hardware Pipeline for a sequence of 5 instructions executed serially.

[0030]
FIG. 5 illustrates the same 5 instructions executed in a single cycle loop with 20 iterations with serial execution, no parallelism and no software pipelining.

[0031]
FIG. 6 illustrates the same 5 instructions executed in a loop with 20 iterations with software pipelining.

[0032]
FIG. 7A illustrates the states of a state machine capable of implementing the software program loop procedures according to the present invention; FIG. 7B illustrates principal components of the program memory control unit used in software pipeline loop implementation according to the present invention; and FIG. 7C illustrates the principal components of a dispatch buffer unit according to the present invention.

[0033]
FIG. 8 illustrates the instruction set of a software pipeline procedure according to the present invention.

[0034]
FIG. 9 illustrates the application of the instruction stage to the dispatch crossbar unit according to the present invention.

[0035]
FIG. 10A is a flowchart illustrating the SPL_IDLE execution response to a SPLOOP instruction, FIG. 10B(1) and FIG. 10B(2) illustrate SPL_PROLOG state response to an SPLOOP instruction, FIG. 10C illustrates the SPL_KERNEL state response to a SPLOOP instruction, FIG. 10D(1) and FIG. 10D(2) illustrate the response of an SPL_EPILOG state to a SPLOOP instruction, FIG. 10E illustrates the response of the SPL_EARLY_EXIT state to a SPLOOP instruction, and FIG. 10F(1) and FIG. 10F(2) illustrate the response of the SPL_OVERLAP state according to the present invention.

[0036]
FIG. 11A illustrates a software pipeline loop for a group of five instructions, while FIG. 11B illustrates an SPL_EARLY_EXIT for the same group of instructions.

[0037]
FIG. 12A illustrates a program for a software pipeline loop procedure that includes an instruction that is not repeated; while FIG. 12B illustrates a technique for preventing a non-loop instruction from being included in the iterative software pipeline loop procedure according to the present invention.

DESCRIPTION OF THE PREFERRED EMBODIMENT

[0038] 1. Detailed Description of the Figures

[0039] Referring to FIG. 7A, the states of a state machine capable of implementing the software loop instruction according to the present invention are shown. In the SLP_IDLE state 701, the loop buffer apparatus is not active. The loop buffer apparatus will leave the SPL_IDLE state when a valid SPLOOP instruction is present in the program register stage. When leaving the SPL_IDLE state 701, the prediction condition, the dynamic length (DYNEN) and the initiation interval (II) are captured. In addition, the prediction condition is evaluated to determine the next state. When the prediction condition is false, the SPL EARLY EXIT state 705 is entered. In either situation, the prolog counter and the II counter are reset to zero. For normal operation in response to a SPLOOP instruction, the state machine enters the SPL_PROLOG state 702. In this state, the sequence of instruction stages from the instruction register are executed and stored in a buffer memory unit. In addition, an indicia of the execution unit associated with each instruction stage is stored in a scratchpad memory. After each instruction has been executed at least once and stored in the buffer memory unit, the SPL_PROLOG state 702 transitions to the SPL_KERNEL state 703. In the SPL_KERNEL state 703, the instruction stages in the buffer memory unit are executed simultaneously until the first instruction stage in the sequence has been executed the predetermined number of times. After the execution of the first instruction stage the predetermined times, the state machine enters the SPL_EPILOG state 707. In this state, the buffer memory is drained, i.e., the instruction stages are executed the predetermined number of times before being cleared from the buffer memory unit. At the end of the SPL_EPILOG state 707, the state machine typically transitions to the SPL_IDLE stage 701. However, during the SPL_EPILOG state 707, a new SPLOOP instruction may be entered in the program register. The new SPLOOP instruction causes the state machine to transition to the SPL_OVERLAP state 706. In the SPL_OVERLAP state 706, the instruction stages from the previous SPLOOP instruction continue to be drained from the buffer register unit. However, simultaneously, an SPL_PROLOG state 702 for the new SPLOOP instruction can execute instructions of each instruction stage and enter the instruction stages for the new SPLOOP instruction in the locations of the buffer memory unit from which the instruction stages of the first SPLOOP instruction have been drained. In addition, the state machine has an SPL_EARLY_EXIT state 705 originating from the SPL_PROLOG state 702, the SPL_EARLY_EXIT state 705 transitioning to the SPL_EPILOG state 707 and draining the dispatch buffer register unit 326.

[0040] Referring to FIG. 7B, the principal components needed to implement the software pipeline loop operation according to the present invention are illustrated. The program memory controller unit 32 receives instructions from the program memory/cache unit 31. The instructions received from the program memory/cache unit are applied to the program memory controller 329 where the instructions are processed. In particular, the instructions are divided to the execution packet portions and the valid bit portions, i.e., the valid bits determining to which execution unit the associated execute packet portion is directed. From the program memory controller, execution packets and valid bits are applied to the dispatch crossbar unit 27 prior to transmission to the designated decode/execution units 23/24. The execution packets and the valid bits are applied from the program memory controller 329 to the dispatch buffer controller 320. In dispatch buffer controller 320, the valid bits are entered in the sequence register file 325 and in the dispatch buffer units 323/324. The execution packets are entered in the dispatch buffer register unit 326. The SPLOOP instruction is applied to the state machine 321, to the termination control machine 322 and to the dispatch buffer units 323 and 324. Execution packets from the dispatch buffer register unit 326 and valid bits derived from the sequential register file 325 from the dispatch buffer units 323/324 are applied to the dispatch unit for distribution to the appropriate decode/execution units 23/24. The input register 3251 acts as the input pointer and determines the location in the sequential register file into which valid bits are stored. The output register 3252 acts as an output pointer for the sequential register file 325. Both an input pointer and an output pointer are needed because in one state of operation, valid bits are being stored into the sequential register file at the same time that valid bits are being retrieved from the sequential register file. Similarly, two dispatch units 323 and 324 are needed in order to prepare for a following software pipeline loop procedure while finishing a present software pipeline loop procedure.

[0041] Referring to FIG. 7C, the principal components of a dispatch buffer unit 323, according to the present invention, are shown. The dispatch buffer units 323 include an II register 3231, an II counter register 3232, a dynamic length register 3233, and a valid register file 3234. The II (initiation interval) parameter is the number of execute packets in each instruction stage. The dynamic length (DyLen) parameter is the total number of execute packets in the software pipeline loop program, i.e., the total number of execute packets that are to be repeated. The dynamic length is included in the SPLOOP instruction that initiates the software pipeline loop procedure. The II parameter is included in the SPLOOP instruction and is stored in the II register 3231. The valid bits stored in the valid register file 3234 identify the decode/execution units 23/24 to which the components of the associated execution packet are targeted. That is, the number of rows in the valid register file 3234 is equal to the II, the number of execution packets in each instruction stage.

[0042] The relationship of the states implementing the software pipeline procedure illustrated in FIG. 7A with the apparatus illustrated in FIG. 7B and FIG. 7C can generally be described as follows. A detailed discussion of the operation of the stages will be given with reference to FIG. 10A through FIG. 10F(2). The dispatch buffer controller 320 in the SPL_IDLE state responds to an SPLOOP instruction, from the program memory controller 329, by initializing the appropriate registers, by entering the II parameters (the number of execution packets in an instruction stage) in the II registers 3231 or 3241; by entering the dynamic length parameter in the dynamic length register 3233 or 3343; and by entering the termination condition in the termination register 3221. The state machine 321 then transitions the dispatch buffer controller 320 to the SPL_PROLOG state. In the SPL_PROLOG state, instructions applied to the program memory controller 329 are separated into execute packets and valid bits, the valid bits determining to which execution unit the individual execute packets will be applied. The execute packets and the valid bits are applied to the dispatch crossbar unit 22 for distribution to the appropriate decode/execution units 23/24. In addition, the execute packets are applied to the dispatch buffer controller and stored in the dispatch buffer register unit 326 at locations determined by an II register counter. Similarly, the valid bits are stored in the sequential register file at a location determined by an input register and are stored in a valid register file at a location indicated by the II counter register. The input register and the II counter register are incremented by 1 and the process is repeated. When the II counter register reaches a value determined by the II parameter stored in the II register 3231, the II counter register is reset to zero. The II register identifies the boundaries of the instruction stages. The procedure continues until the input counter is equal to the value in the dynamic length register 3233. At this point the state machine transitions the apparatus to the SPL_KERNEL stage. In the SPL_KERNEL stage, the program memory controller is prevented from applying execute packets and valid bits to the dispatch buffer controller 320. the execute packets stored in the dispatch buffer unit and the associated valid bits stored in the valid register file, each at locations indexed by the II counter register, are applied to the dispatch crossbar unit 22. The II counter register is incremented by 1 after each application of the execute packets and associated valid bits to the dispatch crossbar unit 22. When the count in the II counter register 3232 is equal to the II parameter in the II register 3231, the II counter register is reset to zero. The process continues until the termination condition identified by the termination condition register 3221 is identified. Upon identification of the termination condition, the state machine transitions the dispatch buffer controller 320 to the SPL_EPILOG state. In the SPL_EPILOG state, execute packets are retrieved from the dispatch buffer register unit 326 at locations determined by the II counter register. Valid bits are retrieved from the valid register file 3234 also at locations identified by the II counter register 3232 and applied to the dispatch crossbar unit 22. The valid bits in the sequential register file 325 are retrieved and combined with the valid bits in the valid register file in such a manner that, in future retrievals from the dispatch buffer register 326, the execution packets associated with the valid bits retrieved from the sequential register file are thereafter masked from being applied dispatch crossbar unit. The II counter register is incremented by 1, modulo II, after each execution packet retrieval. The output register is incremented by 1 after each execution packet retrieval. The procedure continues until the output register equals the parameter in the dynamic length register. When this condition occurs, the state machine transitions the SPL_IDLE state. When the termination condition is identified during the SPL_PROLOG state, the state machine causes the dispatch buffer controller to enter the SPL_EARLY_EXIT state. In the SPL_EARLY_EXIT state, the output register begins incrementing even as the input register is still incrementing. In this manner, all execution packets are entered in the dispatch buffer register unit 326. However, the dispatch buffer controller has already started masking execution packets stored in the dispatch buffer register unit (i.e., upon identification of the termination condition) in the manner described with respect to the SPL_EPILOG state. The procedure will continue until the contents of the output register are equal to the contents of the dynamic length register. An SPL_OVERLAP state is entered when a new SPLOOP instruction is identified before the completion of the SPL_EPILOG state. A second dispatch buffer unit is selected to store the parameters associated with the new SPLOOP instruction. The other dispatch buffer unit continues to control the execution of the original SPLOOP instruction until the original SPLOOP instruction execution has been completed.

[0043] Referring to FIG. 8, an example of the structure of the instruction group that can advantageously use the present invention is shown. A value is defined in the termination control register 3221. This value determines the number of times that a group of instructions is to be repeated. The instruction set then includes a SPLOOP instruction. The SPLOOP instruction includes the parameter II and the parameter Dylen (dynamic length). The II parameter is the number of instructions, including NOP instructions that are found in each instruction stage. In the example shown in FIG. 8, instructions stages A, B, C, D, and E are shown. Each instruction stage includes four instructions, i.e., II=4 and the DYLEN=20. Furthermore, the instruction set includes a SUB 1 (substract 1) instruction which operates on the predicate register 301. In this manner, when the predicate register is 0 (P=0), the correct number of repetitions has been performed on at least one instruction stage.

[0044] Referring to FIG. 9, the origin of instruction stages from the apparatus shown in FIG. 7B for an instruction group repeated 20 times is illustrated. During stage cycle 1, instruction stage A1 is applied by the program memory controller unit 30 to the dispatch crossbar unit 22 and to the dispatch buffer unit 55. (Note that an instruction stage can include more than one instruction and an instruction stage cycle will include clock cycles equal to the number of instruction stages.) During instruction stage cycle 2, the instruction stage B1 is applied to the dispatch crossbar unit and to the dispatch buffer unit 55. Also during instruction cycle 2, the instruction stage A2 is applied to the dispatch interface unit 22 from the dispatch buffer unit 55. In instruction cycles 3 through 5, successive instruction stages in the sequence are applied to the dispatch crossbar unit 22 and to the dispatch buffer unit 55. The previously stored instruction stages in the dispatch buffer unit 55 are simultaneously applied to the dispatch crossbar unit 22. At the end of instruction cycle 5, all of the instruction stages A through E are stored in the dispatch buffer unit 55. The SPLOOP prologue is now complete. From cycle 6 until the completion of the SPLOOP instruction at cycle 24, all of the stages applied to the dispatch crossbar unit 22 are from the dispatch buffer unit 55. In addition, instruction stages A1 through E1 have been applied to the dispatch crossbar unit 22 by cycle 5 and, consequently, to the decode/execution unit 23/24. Therefore, after a latency period determined by the hardware pipeline, the result quantity R1(A1, . . . ,E1) of the first iteration of the software pipeline is available. The cycles during which all instruction stages are applied from the dispatch buffer unit 55 to the dispatch crossbar unit 22 are referred to as the kernel of the SPLOOP instruction execution. At cycle 20, the A20 stage is applied to the dispatch crossbar unit 22. Because of the number of iterations for the instruction group is 20, this is the final time that instruction stage A is processed. In instruction stage cycle 21, all of the instruction stages except stage A (i.e., instruction stages B20, C19, D18, E17) are applied to the dispatch crossbar unit 22. During each subsequent cycle, one less stage is applied form the dispatch buffer unit 55 to the dispatch crossbar unit 22. This period of diminishing number of stages being applied from the dispatch buffer unit 55 to the dispatch crossbar unit 22 constitutes the epilog state. When the E20 stage is applied to the dispatch crossbar unit 22 and processed by the decode/execution unit 23/24, the execution of the SPLOOP instruction is complete.

[0045] Referring to FIG. 10A, the response of the program memory control 32 in an SPL_IDLE state to an SPLOOP instruction is illustrated. In step 1000, an SPLOOP instruction is retrieved from the program memory cache unit 31 applied to the program memory controller 329. In response to the SPLOOP instruction, a (non-busy) dispatch memory unit 323/324 is selected. The SPLOOP instruction includes an II parameter, a dynamic length parameter and a termination condition. In step 1002, the II parameter is stored in the II register of the selected buffer, the dynamic length parameter is stored in the dynamic length register of the selected buffer unit in step 1003, and the termination condition is stored in the termination register of the termination control machine 322 in step 1004. The input register 3251 associated with the input pointer of the sequence register file 325 is initialized to 0 in step 1005. In step 1006, the II counter register is initialized to 0. In step 1007, the state machine transitions to the SPL_PROLOG state.

[0046] Referring to FIG. 10B(1) and FIG. 10B(2), the response of the memory controller unit in the SPL_PROLOG state to the SPLOOP instruction is shown. In step 1010, the execute packets and the valid bits from the program memory controller 329 are applied to the dispatch crossbar unit 22. In step 1011, a determination is made whether the first stage boundary has been reached. When the determination in step 1011 is positive, then in step 1012 an execute packet is read from the dispatch buffer register unit at location indexed by the II counter register. Valid bits are read from the valid register file at locations indexed by the II counter register in step 1013. In step 1014, the execute packet and the valid bits from the dispatch buffer controller are applied to the dispatch crossbar unit. When the first stage boundary has not been reached in step 1011 or continuing from step 1014, in step 1015 the execute packet from the program memory controller is stored in the dispatch buffer register unit at locations indexed by the II counter register. In step 1016, the valid bits from the program memory controller are stored in the sequence register file at locations indexed by the input pointer register. In step 1017, the input pointer register is incremented by 1. In step 1018, a determination is made whether the procedure has reached the first stage boundary. When the first stage boundary has been reached in step 1018, then valid bits from the program memory controller are logically ORed into the valid register file at locations indexed by the II counter register in step 1019. When the first stage boundary has not been reached in step 1018, then the valid bits are stored in the valid register file at locations indexed by the II counter register, Step 1019 or step 1020 proceed to step 1021 wherein the II counter register is incremented by 1. In step 1022, a determination is made whether the contents of the II counter register is equal to the contents of the II register. When the contents of the two registers are equal, then the II counter register is reset to zero in step 1023. When the contents of the registers in step 1022 are not equal or following step 1023, a determination is made whether the early termination condition is true in step 1024. When the early termination condition is true, the procedure transitions to the SPL_EARLY_EXIT state. When the early termination condition is not true in step 1024, then a determination is made whether the contents of the input pointer register are equal to the contents of the dynamic length register in step 1026. When the contents of the two registers are equal, the in step 1027 the procedure transitions to the SPL_KERNEL state. When the contents of the two registers are not equal in step 1026, the procedure returns to step 1010.

[0047] Referring to FIG. 10C, the response of the SPL_KERNEL state to the SPLOOP instruction is shown. In step 1035, the program memory controller is disabled to insure that all the instruction being executed are from the dispatch buffer register unit 326. In step 1036, the execute packet at the locations indexed by the II counter register are read from the dispatch buffer register unit 326, while in step 1037, the valid bits at locations indexed by the II counter register in the valid register file are also read. The execute packet from the dispatch buffer register unit and the valid bits from the valid register file are applied to the dispatch crossbar unit in step 1038. In step 1039, the II counter register is incremented by 1. In step 1040, a determination is made if the II counter register is equal to the II register. When the determination is negative, the procedure returns to step 1036. When the determination is positive, the II counter register is set equal to 0 in step 1041. In step 1042, a determination is made whether the termination condition is present. When the termination condition is not present, the procedure returns to step 1036. when the termination condition is present, the program control memory unit transitions to the SPL_EPILOG state in step 1043.

[0048] Referring to FIG. 10D(1) and FIG. 10D(2), the response of program memory control unit to an SPLOOP instruction is and SPL_EPILOG state is shown. The output point is set equal to 0 in step 1049. In step 1050, execute packets and valid bits from the program memory controller are applied to the dispatch crossbar unit. In step 1051, an execute packet from locations indexed by the II counter register are read from the dispatch buffer register unit. Valid bits are read from the valid register file at locations indexed by the II counter register in step 1052. In step 1053, the read valid bits are logically ANDed with the complement of the sequence register file indexed by the output pointer register. The execute packets and the valid bits from the dispatch buffer controller are applied to the dispatch crossbar unit in step 1054. in step 1055, the valid register file locations indexed by the II counter register are logically ANDed with complement of the sequence register file indexed by the output pointer register. In step 1056, the output pointer register is incremented by 1. The II counter register is incremented by 1 in step 1057. In step 1058, a determination is made whether the contents of the II counter register equal the contents of the II register. When the two contents are not equal, then the procedure returns to step 1050. When the quantities in step 1058 are equal, then instep 1059, the II counter register is reset to 0. When the contents are equal in step 1058 or following from step 1059, a determination is whether the execute packet from the program memory controller is a SPLOOP instruction in step 1060. When the execute packet is SPLOOP instruction, the unused dispatch buffer unit is selected for the parameters of the new SPLOOP instruction in step 1061. In step 1062, the II parameter from the new SPLOOP instruction is stored in the prolog II register in the selected dispatch buffer unit. The dynamic length from the new SPLOOP instruction is stored in the prolog dynamic length register of the selected dispatch buffer unit in step 1063. In step 1064, the termination condition from the new SPLOOP instruction is written in the termination condition register. The input counter register is initialized to 0 in step 1065 and the transition is made to the SPL_OVERLAP state in step 1066. The execute packet in step 1060 is not an SPLOOP instruction in step 1060, then in step 1067, a determination is made whether the contents of the output pointer is equal to the contents of the (epilog) dynamic length register. When the contents of the registers are not equal, then the procedure returns to step 1050. When the contents of the two registers are equal, the process transitions to SPL_IDLE state.

[0049] Referring to FIG. 10E, the response of the program memory controller in the SPL_EARLY_EXIT state to a SPLOOP instruction is show. In step 1069, the output pointer is set equal to 0. In step 1070, an execute packet and valid bits from the program memory controller are applied to the crossbar unit. An execute packet is read from the dispatch buffer register unit at locations indexed by the contents of the II counter register in step 1071. In step 1072, valid bits are read from the valid register file indexed by the II counter register. In step 1073, the valid bits are logically ANDed with the complement of the locations of the sequence register file indexed by the output pointer register. The execute packet and the combined valid bits from the dispatch buffer controller are applied to the dispatch crossbar unit in step 1074. In step 1075, the contents of the valid register file indexed by the II counter register are logically ANDed with the complement of the sequence register file location indexed by the output pointer register. The output pointer register is incremented by 1 in step 1076. In step 1077, the execute packet from the program memory controller is stored in the dispatch buffer register unit at locations indexed by the II counter. In step 1078, the valid bits from the program memory controller are stored in the sequence register file at locations indexed by the input pointer register. In step 1079, the input pointer register is incremented by 1, and in step 1080, the II counter register is incremented by 1. In step 1081, a determination is made whether the contents of the II counter register is equal to the contents of the II register. When the contents of the two registers are not equal, the procedure returns to step 1070. When the contents of the registers are equal, the II counter register is reset to 0. A determination is then made whether the contents of the input pointer register are equal to the contents of the dynamic length register. When the contents of the two registers are not equal, the procedure returns to step 1070. When the contents of the two registers are equal, the program memory control unit transitions to the SPL_EPILOG state.

[0050] Referring to FIG. 10F(1) and FIG. 10F(2), the response of the program memory control unit in the SPL_OVERLAP state to a SPLOOP instruction is illustrated. In this state, one of the loop buffer units is in use with the SPLOOP instruction that is in the epilog state. For the prolog portion of the new SPLOOP instruction, the second loop buffer unit will simultaneously be in use in the SPL_OVERLAP state. In step 1090, an execute packet and valid bits from the program memory controller are applied to the dispatch crossbar unit. An epilog execute packet is read from the dispatch buffer register unit from location indexed by the epilog II counter register in step 1091. In step 1092, epilog valid bits are read from the epilog valid register at locations indexed by the epilog II counter register. The epilog valid bits are logically ANDed with the complement of the sequence register file at locations indexed by the output pointer register in step 1093. In step 1094, the epilog execute packet and the combined valid bits from the dispatch buffer controller are applied to the dispatch buffer unit. The output pointer register is incremented by 1 in step 1095 and the epilog II counter register is incremented by 1 in step 1096. In step 1092, a determination is made whether the contents of the epilog II counter register are equal to the contents of the epilog II register. When the contents are equal, the epilog II counter register is set to 0 in step 1098. When the contents of the registers are not equal in step 1092, the procedure advances to step 1098 wherein a determination is made whether the first stage boundary has been reached. When the first stage boundary has been reached, a prolog execute packet is read from the dispatch buffer register at locations indexed by the prolog II counter register in step 2000. In step 2001, prolog valid bits are read from the prolog valid register file at locations indexed by the prolog II counter register. The prolog execute packet and the prolog valid bits from the dispatch buffer controller are applied to the dispatch crossbar unit in step 2002. When the first stage boundary has not been reached or continuing from step 2002, in step 2003, the execute packet from the program memory controller is stored in the dispatch buffer register unit at locations indexed by the prolog counter register. In step 2004, valid bits from the program memory controller are stored in the sequence register file at location indexed by the input pointer register. The input pointer register is incremented by 1 in step 2006 and the prolog II counter register is incremented by 1 in step 2005. In step 2007, a determination is made whether the contents of the prolog II counter register is equal to the contents of the prolog II register. When the contents of the two registers are equal, in step 2008, the prolog II counter register is reset to 0. When the contents of the registers are not equal of after step 2008, in step 2009, a determination is made whether the contents of the output pointer is equal to the contents of the epilog dynamic length register. When the contents of the registers are not equal, the procedure returns to step 1090. When the contents of the registers are equal, a determination is made in step 2010 whether the contents of the input pointer register is equal to the contents of the prolog dynamic length register. When the contents of the registers are equal, then the procedure transitions to the SPL_KERNEL state. When the contents of the registers are not equal in step 2010, the procedure transitions to the SPL_PROLOG state.

[0051] Referring to FIG. 11A, an example of a software pipeline procedure for five instructions repeated N times is shown. During the SPL_PROLOG state, the dispatch buffer unit is filled. During the SPL_KERNEL state, the instruction stages in the dispatch buffer unit are repeatedly applied to the dispatch crossbar unit until the first instruction stage A has been repeated N times. When the first instruction stage A has been executed N times, the predetermined condition is satisfied and the SPL_EPILOG state is entered. In the SPL_EPILOG state, the dispatch buffer is gradually drained as each instruction stage is executed N times. The procedure in FIG. 11A is to be compared to FIG. 11B wherein the condition is satisfied before the end of the SPL_PROLOG state. Once the condition is satisfied in the SPL_PROLOG state, then the program memory controller enters the SPL_EARLY_EXIT state. In this state, the instruction stages remaining in the program memory/cache unit continue to be entered in the dispatch buffer unit, i.e., the input pointer continues to incremented until the final location of the scratch pad register is reached. However, after the application of each instruction stage to the dispatch crossbar unit, the output pointer is also incremented resulting in the earliest stored instruction stage being drained from the dispatch buffer unit. This simultaneous storage in and removal from the dispatch buffer unit is shown in the portion of the diagram designated as the early exit.

[0052] Referring to FIG. 12A, a program for implementing a software pipeline loop procedure is shown. The program includes a non-loop instruction, i.e., an instruction that is to be performed once (during the SPL_PROLOG state), but not repeated. The software pipeline loop procedure is preceded by an SPLOOP instruction. The instruction sequence A through F are the execute packets that are to be executed several times in a software pipeline loop procedure. However, execute packet D includes an SPMASK instruction. The SPMASK instruction is to be performed a single time during the SPL_PROLOG state and not to be executed thereafter. The SPMASK instruction includes indicia that indicates which of the instructions, i.e., instr 1, in the execute packet is to be performed only once. In other words, instr 1 is masked.

[0053] Referring to FIG. 12B, the technique for executing a non-software pipeline loop instruction during an SPL_PROLOG state, according to the present invention, is shown. During the SPL_PROLOG state, the plurality of instructions shown as execute packet D in FIG. 12A is entered in the program memory controller 329. Each instruction includes execute packets and associated valid bits. The associated valid bits identify the position of each execute packet when being applied to the dispatch crossbar unit 22 and the dispatch buffer register unit 326. The SPMASK instruction includes the predefined signal group indicating that associated instruction and valid bits are to be applied to dispatch crossbar unit 22 for execution. The presence of the predefined signal group causes the valid bits of the masked instruction to be zero when applied to the dispatch buffer controller 320, i.e., in the dispatch buffer unit 323 and in the sequence register file.325. In this manner, because of the zero valid bits associated with the masked instruction, the masked instruction will not be stored in the dispatch buffer register unit 328. Consequently, the (masked) instruction is executed only once in the SPL_PROLOG state.

[0054] However, a further problem exists. When an interrupt signal is generated and after processing of the interrupt, the software pipeline loop is restarted by entering the SPL_PROLOG state and refilling the pipeline. However, the software pipeline loop procedure has not been cancelled, but suspended at an intermediate point. Therefore, the instruction set D including the SPMASK instruction will be retrieved from the program memory/cache unit. However, the SPMASK instruction has already been executed and should not be executed again. To prevent a second execution of the SPMASK instruction, when an interrupt signal is generated, a bit is set in the control register 390. The signal set in the control register 390 by the interrupt signal is applied to the program memory controller 329. When the SPMASK instruction is entered in the program memory controller 329 after the processing of the interrupt condition, the SPMASK instruction with the predefined signal bit (identifying the SPMASK instruction as an execute once instruction) results, when the instruction D is applied to the dispatch crossbar unit, the valid bit associated with the SPMASK instruction are all zero. Therefore, when the SPMASK execution unit is applied to the dispatch crossbar unit, the execution packet will not be transmitted to execution because of the zero valid bits. Similarly, because of the zero valid bits, the SPMASK instruction originating from the dispatch buffer register unit 326 will not be transmitted by the dispatch crossbar unit 22.

[0055] 2. Operation of the Preferred Embodiment

[0056] The operation of the invention can be understood in the following manner. The instruction stream transferred from the program memory/cache unit to the program memory controller includes a sequence of instruction sets. The software pipeline is initiated when the program memory controller identifies the SPLOOP instruction. The SPLOOP instruction is followed by series of instruction sets. The series of instruction sets has length known as the dynamic length (DYNLEN). Each instruction can be comprised of group of sub-instructions. This group of sub-instructions have a length for each instruction is called an initiation interval (II). The dynamic length divided by the initiation interval (DynLen/II) provides the number of stages, each group of sub-instructions being referred to as an instruction or and instruction stage. An instruction stage can have one or more sub-instructions. Because the three parameters are interrelated, only two need be specified as arguments by the SPLOOP instruction. In addition, the number of times that the series of instruction is to be repeated is also specified in the SPLOOP instruction. The number of stages must be less than the size of the dispatch buffer.

[0057] As will be clear, several restrictions are placed on the structure of each of the stages. The stages are structured so that all of the stages of the instruction group can be executed simultaneously, i.e., that no conflict for resources be present. The number of instructions in each stage is the same to insure that all of the results of the execution of the various stages are available at the same time. These restrictions are typically addressed by the programmer in the formation of the stages of instructions.

[0058] The use of the instruction format and apparatus illustrated by FIG. 12A and FIG. 12B provides programming efficiency. Without the ability to place a selected, single-execution instruction within the group of instructions forming the software pipeline loop, the selected instruction would have to applied to the program memory controller unit earlier and provision made for an interruption of the normal flow of instructions during the SPL_PROLOG state to execute the selected instruction. The use of the SPMASK instruction and the associated apparatus provides that the single-execution component instruction does not conflict with the execution of the software pipeline loop procedure.

[0059] While the invention has been described with respect to the embodiments set forth above, the invention is not necessarily limited to these embodiments. Accordingly, other embodiments, variations, and improvements not described herein are not necessarily excluded from the scope of the invention, the scope of the invention being defined by the following claims.

	Number	Date	Country
	60342706	Dec 2001	US
	60342728	Dec 2001	US

Apparatus and method for a software pipeline loop procedure in a digital signal processor

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