OUT-OF-ORDER LOAD/STORE EXECUTION CONTROL

Abstract: Scheduler logic (e.g., 434a.1, 434a.2, 434a.3, 434a.4, 434a.5, 434a.6, 434b.1, 434b.2, 434b.3, 434b.4, 434b.5, 434b.6) which tracks the relative age of stores with respect to a particular load (and of loads with respect to a particular store) allows a load-store execution controller (e.g., 403, 413, 434a, 434b) constructed in accordance with the present invention to hold younger stores until the completion of older loads (and to hold younger loads until completion of older stores). Address matching logic (510, 610) allows a load-store execution controller constructed in accordance with the present invention to avoid load-store (and store-load) dependencies. Propagate-kill scan chains (e.g., 710) supply the relative age indication of loads with respect to stores (and of stores with respect to loads).

Description: OUT-OF-ORDER LOAD/STORE EXECUTION CONTROL TECHNICAL ART This invention relates to processors, and in particular to out-of-order execution control in a processor having multiple execution units BACKGROUND ART General purpose computers execute programs which are typically represented in executable form as ordered sequences of machine instructions Human-readable representations of a program are converted to sequences of machine instructions for a desired target architecture, e g , to object code for a processor conforming to the x86 processor architecture, in a process known as compilation Typically, computer programs are designed, coded, and compiled with a simplifying assumption that the resulting object code will be executed in sequential order However, despite this assumption, modem processor design techniques seek to exploit opportunities for concurrent execution of machine instructions, I e , instruction parallelism To maximize computational throughput, superscalar techniques can be used to map instruction parallelism to multiple execution units [n contrast, pipelining techniques involve the exploitation of instruction parallelism within stages of a single functional unit or execution path Superscalar techniques, which are known in the art of superscalar processor design, include out-of-order instruction issue, out-of-order instruction completion, and speculative execution of instructions Out-of-order instruction issue involves the issuance of instructions to execution units with little regard for the actual order of instructions in executing code A superscalar processor which exploits out-of-order issue need only be constrained by dependencies between the output (results) of a given instruction and the inputs (operands) of subsequent instructions in formulating its instruction dispatch sequence Out-of-order completion, on the other hand, is a technique which allows a given instruction to complete (e g store its result) prior to the completion of an instruction which precedes it in the program sequence Finally, speculative execution involves the execution of an instruction sequence based on predicted outcomes (e g , of a branch) Speculative execution (i e , execution under the assumption that branches are correctly predicted) allows a processor to execute instructions without waiting for branch conditions to actually be evaluated Assuming that branches are predicted correctly more often than not. and assuming that a reasonable efficient method of undoing the results of an incorrect prediction is available, the instruction parallelism (I e , the number of instructions available for parallel execution) will typically be increased by speculative execution (see Johnson. Superscalar Processor Design, Prentice-Hall. Ine , New Jersey, 1991 , pp 63- 77 for an analysis) Executing instructions out of sequential order, l e , issuing and completing instructions out of sequential order, can increase a superscalar processor s performance by allowing the superscalar processor to keep multiple execution units operating in parallel and therebv improving throughput Accordingly, a scheduler for a superscalar processor can improve overall performance by determining which instructions can be executed out-of-order and providing, or dispatching, those instructions to appropriate execution units A scheduler for a superscalar processor must also handle interrupts and traps Many processor architectures, including the x86 processor architecture, require that an architectural state be known just before or after an instruction generates an error, interrupt, or trap This presents a difficulty when instructions are executed out of sequential order Therefore, the scheduler must be able to undo instructions and reconstruct the system ' s state as if instructions executed in sequential order Architectural designs for exploiting the instruction parallelism associated with each of these techniques have been proposed in a variety of articles and texts For a discussion, see Johnson, pp 127- 146 (out of order issue), pp 103-126 (out-of-order completion and dependency), pp 87- 102 (branch misprediction recovery) Two architectural approaches for exploiting instruction parallelism are the reservation station and the reorder buffer A reservation station is essentially an instruction and operand buffer for a given execution unit within a processor which includes multiple execution units, however, in addition to buffering instructions and operands, a reservation station provides a means for directly receiving results from other execution units In this way, an instruction for which operands are not yet available can be dispatched to the reservation station for a given execution unit without waiting for its operands to be stored in and then retrieved from a register Tomasulo, "An Efficient algorithm for Exploiting Multiple Execution Units," IBM Journal, vol 1 1 , January 1967, pp 25-33, discloses a floating point processor implementation which includes multiple execution units, each with a reservation station A reorder buffer is a content-addressable store which maintains the speculative (l e., out-of-order) state of registers in a processor which includes multiple execution units When each instruction is decoded, a reorder-buffer entry is allocated to store the instruction's result and a temporary identifier, or tag, is created to identify the result In a normal instruction sequence, a given register may be written many times and therefore multiple reorder buffer entries will be allocated, corresponding to the state ofthe register at different points in the instruction sequence As instructions which require register values as operands are dispatched, the most recently allocated reorder buffer entry is referenced, or if no reorder buffer entry corresponds to the required register location, the value stored in the register file is used Assuming that a corresponding reorder buffer entry has been allocated, the value of an operand required by a given instruction is supplied by the reorder buffer if the instruction which computes the operand value has completed, otherwise, a tag is supplied allowing the instruction to recognize the result when it becomes available A superscalar processor design which incoφorates a reorder buffer also provides facilities to retire reorder buffer entries (i e , store the entry value to the register file or discard the entry if no longer needed) A reorder buffer implementation facilitates various superscalar techniques including register renaming, branch misprediction exception handling, and out-of-order instruction completion A superscalar architecture which includes reservation stations and a reorder buffer also facilitates the exploitation of instruction parallelism among execution units which receive operands from, and store their results to. a reorder buffer Superscalar techniques largely concern processor organization independent of instruction set and other architectural features Thus, one of the attractions of superscalar techniques is the possibility of developing a processor that is code compatible with an existing architecture, for example the x86 processor architecture Many superscalar techniques apply equally well to either RISC or CISC architectures However, because of the regularity of many of the RISC architectures, superscalar techniques have initially been applied to RISC processor designs In particular, the three operand load/store architecture, fixed instruction lengths, limited addressing modes, and fixed- width registers associated with a RISC architecture and instruction set facilitate the single cycle decoding of multiple instructions necessary to supply multiple execution units with work One approach to developing a superscalar processor that is code compatible with an x86 architecture has been to dynamically translate x86 instructions into RISC instructions, or operations, which may then be executed by a RISC core or execution engine Techniques for designing such a superscalar RISC processor are described in Johnson. Superscalar Processor Design DISCLOSURE OF THE INVENTION It has been discovered that loads and stores may generally be executed independently and out-of-order with respect to each other in a processor which provides an out-of-order load-store execution controller Scheduler logic which tracks the relative age of stores with respect to a particular load (and of loads with respect to a particular store) allows a load-store execution controller constructed in accordance with the present invention to hold younger stores until the completion of older loads (and to hold younger loads until completion of older stores) Address matching logic allows a load-store execution controller constructed in accordance with the present invention to avoid load-store (and store-load) dependencies. In a processor having a load unit and a store unit, such a load/store execution controller allows load and store instructions to execute generally out-of-order with respect to each other while enforcing data dependencies between the load and store instructions In one embodiment ofthe present invention, a load/store execution controller includes an age ordered array of scheduler operation entries, load hold logic, and scan chain logic Each scheduler operation entry is indicative of a corresponding operation in an operation sequence The load hold logic is coupled to a load unit to selectively inhibit execution of a load operation in the load unit upon receipt of a store older indication The scan chain logic is coupled to the operation entries and to the load hold logic The scan chain logic supplies store older indications indicating the presence of a store operation which is older than a load operation in the load unit In a further embodiment, the scheduler operation entries include operation type and operation state fields and the scan chain logic is coupled to receive the operand type and operand state fields In yet a further embodiment, the store older indications include first and second store older indications The first store older indication indicates the presence of an older store operation in a preliminary stage of store operation evaluation, whereas the second store older indication indicates the presence of an older store operation in a first execution stage of store operation evaluation The scan chain logic differentiates between stages of store operation evaluation using the operation state fields In yet a further embodiment, the store older indications also include a third store older indication indicating the presence of an older store operation in a second execution stage of store operation evaluation In still yet a further embodiment the load hold logic includes first and second address match logic The first address match logic is coupled to the store unit to receive a first store target address corresponding to a store operation in the first execution stage of store operation evaluation The first address match logic matches the first store target address against the target address for the load operation The second address match logic is coupled to the store unit to receive a second store target address corresponding to a store operation in the second execution stage of store operation evaluation The second address match logic matches the second store target address against the target address for the load operation In this way, the load hold logic inhibits execution of the load operation in response to the first store older indication The load hold logic also inhibits execution of the load operation in response to the second store older indication when the first address match logic indicates a match between the first store target address and the target address for the load operation The load hold logic also inhibits execution of the load operation in response to the third store older indication when the second address match logic indicates a match between the second store target address and the target address for the load operation In still yet a further embodiment, the scan chain logic includes first second and third propagate-kill scan chains from older to younger scheduler operation entries The first propagate-kill scan chain supplies the first store older indication when the state and type fields of the scheduler operation entries indicate a store operation in the preliminary stage of store operation evaluation which is older than the load operation in the load unit The second propagate-kill scan chain supplies the second store older indication when the state and type fields ofthe scheduler operation entries indicate a store operation in the first execution stage of store operation evaluation which is older than the load operation in the load unit The third propagate-kill scan chain supplies the third store older indication when the state and type fields ofthe scheduler operation entries indicate a store operation in the second execution stage of store operation evaluation which is older than the load operation in the load unit In still yet a further embodiment, the scan chain logic includes multiplexing logic and an AND-tree of operation entry level propagate signals The AND-tree supplies a plurality of carry-in signals in response to the operation entry level propagate signals, which are functions of the operand type and operand state fields of the corresponding scheduler operation entry The multiplexing logic is coupled to the AND-tree to receive the carry-in signals and is selective for a particular one of the carry-in signals corresponding to a scheduler operation entry associated with the load operation in the load unit In another embodiment ofthe present invention, a load/store execution controller includes an age ordered array of scheduler operation entries, store hold logic, and scan chain logic Each scheduler operation entry is indicative of a corresponding operation in an operation sequence The store hold logic is coupled to a store unit to selectively inhibit execution of a store operation in the store unit upon receipt of a load older indication The scan chain logic is coupled to the operation entries and to the store hold logic The scan chain logic supplies load older indications indicate the presence of a load operation which is older than a store operation in the store unit In another embodiment of the present invention for allowing load and store instructions to execute generaliv out-of-order with respect to each other while enforcing data dependencies between the load and store instructions, scan chain logic includes multiplexing logic and an AND-tree of propagate signals The AND-tree supplies a plurality of carry-in signals in response to propagate signals Such propagate signals are functions of operand type and operand state indications from corresponding entries in a scheduler array The multiplexing logic is coupled to the AND-tree to receive the carry-in signals and is selective for a particular one of the carry-in signals corresponding to a load/store entry in the scheduler array In a further embodiment, the load/store entry is associated with a load operation and the propagate signals are indicative ofthe presence, in a corresponding entry of the scheduler array, ofthe load operation The AND-tree supplies a plurality of group carry-in signals in response to the propagate signals and the group carry-m signals correspond to a group of entries in the scheduler array The multiplexing logic includes group logic blocks and an OR-structure The group logic blocks are each responsive to a first conjunction between the corresponding group carry-in signal and any of a plurality of selection signals indicating the presence ofthe load operation within the group of entries in the scheduler array Each ofthe group logic blocks is also responsive to a second conjunction between a propagate signal and a corresponding selection signal The OR-structure is coupled to each of the group logic blocks and supplies a store older indication indicating the presence, in the scheduler array, of at least one store operation older than the load operation In another further embodiment, the load/store entry is associated with a store operation and the propagate signals are indicative ofthe presense, in a corresponding entry ofthe scheduler array, ofthe store operation The AND-tree supplies a plurality of group carry-in signals in response to the propagate signals and the group carry-in signals correspond to a group of entries in the scheduler array The multiplexing logic includes group logic blocks and an OR-structure The group logic blocks are each responsive to a first conjunction between the corresponding group carry-in signal and any of a plurality of selection signals indicating the presence ofthe store operation within the group of entries in the scheduler array Each of the group logic blocks is also responsive to a second conjunction between a propagate signal and a corresponding selection signal The OR-structure is coupled to each ofthe group logic blocks and supplies a load older indication indicating the presense, in the scheduler array, of at least one load operation older than the store operation BRIEF DESCRIPTION OF THE DRAWINGS The present invention may be better understood, and its numerous objects, features, and advantages made apparent to those skilled in the art by referencing the accompanying drawings FIGURE 1 is a block diagram of a superscalar computer processor providing out-of-order execution control in accordance with an embodiment ofthe present invention FIGURE 2 IS a block diagram of a scheduler constructed in accordance with an embodiment ofthe present invention FIGURE 3 IS a pipeline staging diagram illustrating architectural stages in the execution of instructions in accordance with an embodiment of the present invention FIGURE 4 IS a block diagram of out-of-order load and store execution control components in accordance with an embodiment of the present invention FIGURE 5 is a circuit diagram of load hold logic in accordance with an embodiment of the present invention FIGURE 6 IS a circuit diagram of store hold logic in accordance with an embodiment of the present invention FIGURES 7A and 7B are a circuit diagram of a scan chain for load-store ordering logic in accordance with an embodiment of the present invention FIGURE 8 IS a block diagram of a computer system incorporating a processor that provides out-of-order load/store execution control in accordance with an embodiment of the present invention Use ofthe same reference symbols in different figures indicates similar or identical items rVlODE(S) FOR CARRYING OUT THE INVENTION FIGURE 1 depicts a superscalar processor embodiment ofthe present invention Superscalar processor 100 includes an execution engine 150 which implements a reduced instruction set computing (RISC) architecture, an instruction decoder 140, caches, and a system interface 120 providing access to an address space represented in memory subsystem 122 and to devices on local busses (not shown) Superscalar processor 100 includes a cache which, in the embodiment described herein, is organized as separate data and instruction portions Data cache 170 and instruction cache 130 are coupled (through cache control logic 160 and via system interface 120) to the address space represented in memory subsystem 122 which includes main memory and optionally includes additional levels of cache, illustratively an L2 cache Access to an L2 level cache, i e , to L2 cache control logic and an L2 data portion (not shown), may be provided via system interface 120 Alternatively. L2 cache control logic may be inteφosed between cache control logic 160 (for L l ) and system interface 120 Cache system designs are well known in the art In particular, suitable designs implementing split. "Harvard Architecture" instruction and data caches (such as 170 and 130) and multi-level cache hierarchies are well known in the cache arts In most respects, the cache subsystem of superscalar processor 100 (l e , data cache 170 instruction cache 130. cache control logic 160. and an optional L2 cache) is of any such suitable design However. for reasons apart from its caching performance, instruction cache 130 is integrated with pre-decode logic (not shown) Such integrated pre-decode logic identifies x86 instruction boundaπes in the fetched instruction stream and facilitates the rapid decoding of instructions by instruction decoder 140 Referring again to FIGURE 1, instruction sequences are loaded from the memory subsystem into instruction cache 130 for anticipated execution by execution engine 150 In accordance with the embodiment of processor 100 shown in FIGURE 1 , instructions in instruction cache 130 are CISC instructions selected from a complex instruction set such as the x86 instruction set implemented by processors conforming to the x86 processor architecture Instruction decoder 140 converts CISC instructions received from instruction cache 130 to operations for execution engine 150 In the embodiment of FIGURE 1 , these operations are RISC-like operations (hereafter Ops) and a single x86 instruction from instruction cache 130 decodes into one or more Ops for execution engine 150 Individual Ops fall into one of several type groups including register operations (RegOps), load-store operations (LdStOps), load immediate value operations (LIMMOps), special operations (SpecOps), and floating point operations (FpOps) Alternative embodiments may decode different instruction sets and supply different operation types for execution Instruction decoder 140 includes two instruction translation portions, a hardware translation portion MacDec 141 and a ROM-based translation portion 142, together with branch prediction logic 143 Most common x86 instructions are translated into short sequences of 1 to 4 Ops using multiple parallel hardware decoders included in hardware translation portion 141 Hardware translation portion 141 decodes these common x86 instructions received from instruction cache 130 into short sequences of Ops which are then supplied to scheduler 180 Less common x86 instructions and those x86 instructions which translate into Op sequences longer than 4 Ops are translated by a ROM-based translation portion 142 which fetches (from ROM) a translated sequence of Ops corresponding to the particular x86 instruction to be translated Translated Op sequences from either source, whether generated by hardware decoders or fetched from ROM, are supplied to scheduler 180 for execution by execution engine 150 Referring again to FIGURE 1 , execution engine 150 includes a scheduler 180. a register file 190, and multiple execution units which receive and execute Ops dispatched by scheduler 180 In the embodiment of FIGURE I , execution engine 150 includes seven execution units load unit 152, store unit 153, register units 154 and 155, floating point unit 156, multimedia unit 157, and a branch unit 158, although altemative embodiments may add to or subtract from the set of execution units In an exemplary embodiment, floating point unit 156 and multimedia unit 157 are omitted Execution engine 150 also includes a store queue 159 inteφosed between store unit 153 and data cache 170 Scheduler 180 is organized as an ordered array of storage entries and logic blocks coupled thereto, which together provide support for out-of-order dispatch of Ops to execution units and for forwarding of Op results to one or more execution units The ordered array of storage entries and logic blocks also implements a reorder buffer and provides for renaming of the architectural registers defined in register file 190 and speculative execution recovery Instruction decoder 140 supplies scheduler 180 with new Ops decoded from the instruction stream In turn. scheduler 180 stores and maintains (in a storage entry) data associated with each new Op received ln this wav scheduler 180 tracks the status of each Op and its associated data as the Op is issued to. and executed b> . an execution unit After a given Op is fully executed and data dependencies have been resolved, it is retired and the corresponding scheduler entry is released Scheduler 180 is coupled to execution units (i e . load unit 152. store unit 153, register units 154 and 155, floating point unit 156, multimedia unit 157, and branch unit 158) via a group of busses and control lines collectively shown as a bus 189 Scheduler 180 supplies Ops, register operands, and control signals to the execution units and receives result values and status indications back from the execution units, illustratively via bus 189 Of course, all busses and control lines need not be fully connected and bus 189 is merely illustrative of the bi¬ directional coupling of scheduler 180 with the execution units Load unit 152 and store unit 153 execute LdStOps, respectively loading data from and storing data to addressable memory Depending on the caching state of a particular memory address, a LdStOp may complete at the L l data cache 170, at an L2 cache (not shown), or at main memory (also not shown) Store queue 159 temporarily stores data from store unit 153 so that store unit 153 and load unit 152 can operate in parallel without conflicting accesses to data cache 170 Register units 154 and 155 execute RegOps which operate on a data associated with the architectural registers of register file 190 Scheduler Overview FIGURE 2 depicts an exemplary embodiment of scheduler 180 having 24 entries (shown as rows) wherein each entry is associated with a pending Op Each entry includes a series of fields, collectively shown as scheduling reservoir 240, for representing static and dynamic data associated with a pending Op In addition, scheduler 180 provides a series of specialized logic blocks, collectively shown as control logic 230, coupled to the entries of scheduling reservoir 240 to receive data associated with pending Ops The specialized logic blocks (shown as columns 231. 232. 233, 235. and 236) of control logic 230 supply signals which control the sequencing of Op execution and the supply of operands to and distribution of results from the execution units Control logic 230 includes issue selection logic 231. operand selection logic 232, load-store ordering logic 234, status flag handling logic 235. and self-modifying code support logic 536 Issue selection logic 231 controls the selection of Ops from scheduling reservoir 240 for issue to available execution units during each cycle Operand selection logic 232 identifies an appropriate source for operand data required by Ops which have been issued to execution units Depending on data dependencies and sequencing of Ops within the execution engine 150. the appropriate source may be register file 190. a destination value field associated with another pending Op entry (destination value fields for scheduler entries are shown collectively as 250), or the result of a completed Op which is supplied on one ofthe result buses (shown collectively as result busses 272) Control signals supplied by issue selection logic 231 and operand selection logic 232 allow scheduler 180 to issue Ops from scheduling reservoir 240 to available execution units and to select the appropriate operand source for each Op issued Scheduler 180 includes a destination value field associated with each scheduler entry Collectiveh these destination value fields are shown as 250 In conjunction with operand selection logic 232, destination value fields 250 implement a reorder buffer and implicit register renaming Operand values associated with architectural registers of register file 190 are represented in destination value fields 250 and are typically supplied to execution units as register operand values via operand busses 271 However, operand values may instead be supplied from register file 190 if none ofthe destination value fields 250 represent a more recent register state (i e . an as yet uncommitted register state) Results of completed Ops are supplied via result busses 272 to the destination value field ofthe scheduler entry associated with the completed Op In addition, these results may also be supplied to execution units as operands for pending Ops Results are forwarded via result busses 272 The fields of a scheduling reservoir entry (illustratively, scheduling reservoir entry 240.1 ) contain information regarding an operation (Op) which is awaiting execution, which is in the process of being executed, or which is completed Most ofthe fields of a scheduling reservoir entry are initialized when instruction decoder 130 loads a new Op into scheduling reservoir 240 However, other fields are later loaded or updated For example, a state field (shown for each entry as field 242) is updated as the corresponding Op advances through stages of an execution pipeline Storage fields that retain a value from the time an Op is loaded into scheduling reservoir 240 until retired from scheduler 180 are referred to as "static fields " Fields which can be updated with new values are referred to as "dynamic fields " In the context of load/store execution control, two fields, the type field 241 and the state field 242, bear further discussion A 3-bit field, Type [2 . 0] , of each scheduling reservoir entry (shown in FIGURE 2 as type field 241 ) specifies the Op type associated with the scheduling reservoir entry Op type is particularly important for issue selection puφoses (e g , LdOps should issue to a load unit such as 150), however, load/store ordering control also makes use of type field 241 The following signals are decoded from type field 241 000= A Special operation not actually executed 010=LU A LdOp executed by load unit 152. lθx=SU A Stop executed by store unit 153. 101=ST A StOp which references memory or at least generates a faultable address (i.e. not an LEA operation) llx=RU A RegOp executed by register un t X 154 or possibly register unit Y 155. 110=RUX A RegOp executable ONLY by register unit X 154. 111=RUY A RegOp executable by register unit X 154 or register unit Y 155. A 4-bit field, State [3 . 0 ] , of each scheduling reservoir entry (shown in FIGURE 2 as type state 242) indicates the current execution state of an Op (S3, S2 , Sl. and SO are altemate signal names for State [3 : 0] ) Five possible states of type field 242 are encoded by a shifting field of ones as follows 0000 Unissued 0001 Stage 0 0011 Stage 1 om Stage 2 1111 Completed Intermediate states correspond to the current execution stage for an Op corresponding to the entry in which the type field appears The bits are updated (effectively by left shifting) as the Op is successfully issued or advances out of a stage state [ 3 - 0 ] is also set to 1 1 1 1 during abort cycles Scheduler Op Quad Organization Scheduler 180 includes 24 entries in scheduling reservoir 240 and destination value fields 250 which are managed as a FIFO Data corresponding to new Ops are loaded in at the "top," shift toward the "bottom" as execution progresses, and are retired from the bottom of storage reservoir 240 To simplify control, scheduler 180 manages scheduling reservoir 240 and destination value fields 250 on an Op quad basis Ops are loaded into, shifted through, and retired from scheduling reservoir 240 in groups of four In this way, scheduler granularity matches the decode bandwidth of both the emcode ROM 142 and MacDec 141 of instruction decoder 140 Scheduler 180 therefore manages 24 Op entries as six Op quad entries in a six-deep, four-wide FIFO Despite the Op quad organization of scheduler 180, many aspects of scheduler operation are best understood by viewing the scheduling reservoir 240, destination value fields 250, and control logic 230 in the context of 24 entry granularity For illustrative puφoses, the discussion which follows is made in terms of a 24- entry scheduler 180, although those skilled in the art will recognize the advantages of Op quad granularity presented in the above-referenced co-pending application Operation (Op) Timing and Execution Stages Each entry of scheduling reservoir 240 includes fields describing outstanding Ops These fields store static information originally derived from the Ops fetched or decoded by instruction decoder 140 and also dynamic state information resulting from Op execution or characterizing the execution pipeline status of a given Op From a processor control perspective, scheduler 180 is an instruction sequence-ordered array of Op state information (scheduling reservoir 240) with associated control logic 230 generating control signals to issuing Ops from the array to respective execution units, to control Op execution through sequences of pipeline stages, and to eventually retiring Ops from the scheduler As shown in FIGURE 2, control logic 230 includes five specialized blocks of control logic (issue selection logic 231, operand selection logic 232, load-store ordering logic 234, status flag handling logic 235. and self-modifying code support logic 236), each having portions (illustratively portion 234.3 of load-store ordering logic 234) receiving information from corresponding entries of scheduling reservoir 240 Control logic blocks supply control signals to the execution units For example, load-store ordering logic 234 supplies control signals to load unit 152 and store unit 153 via control lines represented collectively as 273 The particular control signals supplied by control logic blocks of scheduling reservoir 240 depend on the state of fields in Op entries ln particular the state [3 0] field indicates the progress of execution of associated operations From a logical perspective, all state sequencing within the scheduler is single cycle in nature State transition decisions are made each cycle based on the machine state during the cycle The structure of scheduler 180 reflects the pipelined nature of Op execution Scheduler 180 (and correspondingly each entry) can be divided into many distinct, rather independent logic portions, each of which is directly associated with a specific processing stage of a given type of operation or execution pipeline Pipeline staging of execution engine 150 is now described with reference to FIGURE 3 Once an Op is loaded into execution engine 150, the Op goes through a three or four stage pipeline, and correspondingly transitions between four or five states represented by the field State [3 . 0 ] within the scheduler entry associated with the Op Instruction fetch and decode are performed before execution engine 150, therefore the first scheduler- related pipeline stage is the issue stage FIGURE 3 shows pipeline staging for RegOps and LdStOps Scheduler 180 exerts primary control over execution pipelines during the issue and operand fetch stages, 330 and 340 Processing within issue stage 330 and within operand fetch stage 340 can be broken down into two phases per stage, wherein each phase nominally occupying a half clock cycle Issue stage 330 includes an issue selection phase and a broadcast phase, while operand fetch stage 340 includes an operand selection phase and operand forwarding phase Issue Stage During the issue selection phase 330.1 of issue stage 330, scheduler 180 selects the next Ops to enter the pipelines associated with load unit 152, store unit 153, register unit X 154, and register unit Y 155 (four Op selections occur at once) During the broadcast phase 330.2 of issue stage 330. information about each ofthe register operands for each selected Op is broadcast to all scheduler entries and to extemal logic (including register file 190 and the execution units) In this way, the broadcast phase 330.2 sets up to locate operand values which may reside in one of the destination value fields 250 of scheduler 180 or in register file 190, or which may correspond to results to be produced on result busses 272 one ofthe execution units (e g , load unit 152, store unit 153, or register units 154 and 155) Operand Fetch Stage During the operand selection phase 340.1 of operand fetch stage 340, scheduler 180 locates up to eight operand values (4 Ops * 2 operands/Op) and determines the status of each operand value, I e , whether a valid value is in fact available from the designated source Based on this information, scheduler 180 determines which of the Ops in operand fetch stage 0 (stage 340) will advance into their respective execution pipes, I e , into stage 1 (stage 350), following the operand forward phase Advancement decisions are made independently for each Op and only operand dependencies need constrain the order with which operations are actually executed Absent such data dependencies, Ops which issue to different execution units are generally processed through their respective pipelines in arbitrary order with respect to those Ops assigned to other execution units One exception to this general rule involves the respective ordering of loads and stores (1 e of LdOps and StOps) and is in greater detail discussed below LdStOp Execution Stages The first two scheduler-related stages, the operand issue" stage 330 and the "operand fetch" stage 340 are common to RegOps and LdStOps Subsequent stages are the execution stages RegOps include a single execution stage 350 because all RegOps execute in a single cycle Furthermore, once a RegOp enters the execution stage, it always successfully completes and exits stage 350 at the end of that clock cycle LdStOps, on the other hand, have two execution stages 352 and 360. during which address calculation, segment and page translation (and protection checking), and data cache accessing (in the case of LdOps) all take place Unlike RegOps. LdStOps can be held up for arbitrary periods of time in either stage 360 or 370 Most hold ups appear in the second stage 370 Most commonly, hold ups in stage 370 result from data cache 170 misses, data TLB 171 misses, and page faults Hold ups in stage 360 result from misaligned memory references and from stage 370 being occupied and blocked by an LdStOp not advancing to completion During the operand forward phase 340.2 of operand fetch stage 340. scheduler 180 transfers operand values from the designated sources via operand busses and or result busses shown collectively in FIGURE 2 as busses 271 and 272 to execution units such as load unit 152, store unit 153, register unit X 154, and register unit Y 155 The exemplary embodiment includes nine operand busses 271 , eight of which provide operand values for operations in stage 0 Also in the exemplary embodiment, operand transfers occur regardless of whether values are valid, thereby simplifying control logic If an operand value is invalid, it is ignored by the respective execution unit because the scheduler 180 does not advance the associated operation to stage 1 Immediate values for RegOps are handled as part ofthe register operand forwarding mechanism described above In such cases, the immediate value is forwarded directly from the particular one of the destination value fields 250 of the scheduler 180 entries associated with the Op Displacement values are also transferred during operand forward phase 340.2, via displacement busses 189.4. to load unit 152 and store unit 153 (independent values to each unit) These displacements are 32-bit values and always come from the entries of scheduler 180 The selection ofthe source entry occurs during operand selection phase 340.1 When a LdOp or a StOp enters stage I , load unit 152 and store unit 153 latch associated displacement and operand values Scheduler 180 implements the four-phase control mechanism (as described above) for providing the address operands and displacement, however, StOps require a store data operand in addition to address operands and displacement values Scheduler 180 performs a four-phase process for obtaining the store data for a StOp The StOp data obtaining process is similar to that described above, however the store data is obtained during execution stage 2 (370) ofthe store pipeline The process for providing the store data is synchronized with stages 1 and 2 of the StOp and includes a selection phase 390.1 identifying the StOp in execution stage 1. a broadcast phase 390.2 transmitting information describing the source of a data operand a data operand selection phase 390.3 and an data operand forwarding phase 390.4 In essence, store data is fetched in parallel with StOp execution, and the actual data value is obtained and provided to store queue 159 upon completion of StOp processing If a valid store data value is not available, the StOp is held up in stage 2 Load-Store Ordering Constraints Just as a certain degree of execution ordering must be maintained between Ops which exhibit true data dependencies (as contrasted with mere contention for an architectural register which is avoided by scheduler 180 using register renaming), execution ordering must also be maintained between LdOps and StOps which read from (and write to) the same memory location In general, loads and stores may execute out-of-order with respect to each other, however, if a younger load and older store access the same memory location, the older store should supply the data for the younger load (I e , the younger load should wait for the older store) In such a case, the store data is provided to the younger load via data cache 170 Similarly, an older load must complete before a younger store is allowed to write to the same memory location In such a case, the older store must wait A combination of control logic in scheduler 180 and in load and store units 152 and 153 enforces such load-store ordering constraints Load-Store Ordering Control In addition to the scheduler logic associated with operation issue and operand fetch, entries of scheduler 180 include load-store ordering logic 234 for providing out-of-order load-store execution control Two portions of load-store ordering logic 234, which are respectively associated with load unit 152 and store unit 153, are shown in FIGURE 4 as load ordering logic 434a and store ordering logic 434b Together with load hold logic 403 and store hold logic 413 in the respective execution units, load-store ordering logic 234 enforces load-store execution ordering constraints Load Hold Logic Focusing illustratively on load unit 152, load hold logic 403 checks for StOps in various pipe stages that are older than the LdOp in stage 2 (LU2 402) of load unit 152 In particular, load hold logic 403 checks for older StOps in stage 0, stage 1 (SUI 411 ), and stage 2 (SU2 412), I e , stages 340. 352. and 360 of FIGURE 3 Three signals (SC_SU20LDER, SC_SU10LDER, and SC_SU0OLDER), which are supplied to load hold logic 403 by load ordering logic 434a, signal an older StOp in stages 2, 1 , and 0, respectively More precisely, SC_SU0OLDER indicates the presence of an older StOp in stages of processing earlier than execution stages 1 and 2 (e g , operand fetch stage 0 340 or issue stage 330) Load hold logic 403 also receives a partial memory addresses for the LdOp in stage 2 (LU2 402) of load unit 152 and selectively provides a hold signal (LU2_Hold) to LU2 402 under conditions now described An older StOp in stage 0 (or in an earlier stage) causes load hold logic 403 to unconditionally hold the current LdOp in stage 2 of load unit 152 On the other hand, an older StOp in stage 2 or stage I . holds the current LdOp only if there is also a match between the memory addresses for the LdOp in stage 2 and older StOp The following RTL describes the design and operation of load hold logic 403 // LU2 Hold Logic, // ************** // LU2 Partial Address Match with SU pipe stage 2, AddrMatch2 = (LinAddr (9,3) == SU2_PageOffset (9, 3) ) && (ByteMark & SU2_ByteMark) && 1 (LU2_SpecMem ~ SU2_SpecMem) && SU2_StV, // LU2 Partial Address Match with SU pipe stage 1, AddrMatchl = (LinAddr(9, 3) == SUl_LιnAddr(9, 3) ) && (ByteMark & SUl_ByteMark) &fi ! (LU2_SpecMem " SUl_SpecMem) && SUl_StV; //Hold (LU2 needs to Hold) , // Note that Store Validity is taken into account in the SUnOlder // signals; LU2_Hold = SC_SU201der && (AddrMatch2 | | SMO) | | SC_SU101der && (AddrMatchl j j SUl_FιrstAddr | | SMO) | | DTB_InhSptιvLd && !SC_Ld01dest | | SC_SU0Older | | BusLocked && ILock | | LUViol; Load hold logic 403 supplies the LU2_Hold signal to LU2 402 to inhibit execution of a stage 2 LdOp when any of the above-specified combinations of partial address matches (AddrMatchl or AddrMatch2) and relative age indications (SC_SU20LDER, SC_SU10LDER, and SC_SU0OLDER) from scheduler 180 are present Since no linear address has yet been computed for a StOp in stage 0, a younger LdOp in stage 2 is unconditionally held up for an older stage 0 StOp As the older StOp advances to stages 1 and 2. a partial address mismatch may establish that no ordering constraints are violated by out-of-order completion ofthe younger LdOp and older StOp and load hold logic 403 will release the hold in accordance with the LU2_Hold equation In the exemplary embodiment described herein, a partial address match is performed based on a lower portion of the linear addresses for the potentially matching LdOp and StOp The partial match is designed to select a large enough set of bits to limit the number of false matches, while balancing the speed and critical path impact of address match circuitry In the exemplary embodiment, the partial linear address match is based on the lower bits of respective linear addresses (i e , LinAddr ( 9 , 3 ) , SU2_PageOf f set ( 9 , 3 ) , and SUl_LιnAddr ( 9 , 3 ) ) and balances an acceptable level of false matches with a desired match speed, although alternative embodiments may match larger or smaller numbers of address bits and may perform matches based on virtual, logical, linear, or physical addresses Eight-bit byte marks (ByteMark, SUl_ByteMark, and SU2_ByteMark) are also included in the partial address match These byte marks are expanded variants of corresponding address bits 0, I and 2 which identify the particular bytes upon which a given LdOp or StOp operates, since in the exemplary embodiment (a processor implementation conforming to the x86 processor architecture), 1-byte, 2-byte, 4-byte, and 8-byte loads and stores are all supported In the exemplary embodiment, these bvte marks are compared to identify overlap, and therefore dependencies, between the particular bytes from which a LdOp reads and to which a StOp writes Several additional terms are included in the RTL describing load hold logic 403 For example, load hold logic 403 also inhibits the execution of non-speculative LdOps, i e . those LdOps not allowed to read around a older memory transaction, as indicated by DTB_InhSptιvLd Non-speculative LdOps maintain strict ordering with respect to all older LdStOps, not just older StOps For non-speculative loads, load hold logic 403 ensures that no older memory transactions are pending Since scheduler 180 issues loads in order with respect to each other, that amounts to ensuring that there are no older StOps that have yet to be committed to data cache 170 Scheduler 180 tracks the status of StOps through store queue 159 to data cache 170 and supplies an SC_Ld01dest signal indicating that no older uncommitted StOps exist Referring to FIGURE 4, load hold logic 403 receives indications of the relative age of the LdOp in LU2 402 of load unit 152 from load ordering logic 434a In particular, load hold logic 403 receives an SC_SU20LDER indication, an SC_SU10LDER indication, and an SC_SU0OLDER indication from respective scan chains (SU2 older scan chain 434a.1, SU I older scan chain 434a.2, and SU0 older scan chain 434a.3) of load ordering logic 434a Load hold logic 403 also receives partial address signals for the StOps in SU I 411 and SU2 412 stages of store unit 153 and for the LdOp in LU2 402 of load unit 152 Based on these inputs, load hold logic 403 selectively asserts a hold signal (LU2_Hold) stalling the LdOp in LU2 402 (and also subsequent LdOps) in accordance with the above RTL description LdOps (including Ops, operands, displacement values, and certain control signals) arrive at LU I 401 via respective busses and lines illustratively shown as collective bus 189. Memory locations addressed by LdOps in LU2 402 are accessed via data cache 170 when LU2_Hold is unasserted (or released) and supplied to execution units and scheduler 180 via a result bus 189.2 (not shown) of collective bus 189 Both stages of load unit 152 (LU I 401 and LU2 402) communicate with the data TLB 171 and with other memory management data structures residing at various levels in the memory hierarchy (Ll data cache 170, L2 cache 110, main memory, etc ) to resolve virtual (or linear) addresses to physical addresses Those skilled in the art will recognize a variety of suitable implementations of load hold logic 403 conforming with the above-described RTL Load hold logic 403 is any suitable implementation FIGURE 5 depicts one such suitable implementation in combinatorial logic Store Hold Logic Store unit 153 includes analogous hold logic in the form of store hold logic 413 which checks for LdOps in various pipe stages that are older than the StOp in stage 2 (SU2 412) of store unit 153 Although the design of store hold logic 413 is analogous to load hold logic 403 the two are not symmetric Store hold logic 413 checks for older LdOps in stage I (LU 1 401 ) and stage 2 (LU2 402), l e . stages 352 and 360 of FIGURE 3 Two signals (SC_LU20LDER and SC_LU10LDER) which are supplied to store hold logic 413 by store ordering logic 434b signal an older LdOp in stages 2 and 1 , respectively More precisely. SC_LUlOLDER indicates the presence of an older LdOp in stages of processing earlier than execution stage 2 (e g , execution stage 1 352 operand fetch stage 0 340, or issue stage 330) Store hold logic 413 also receives a partial memory addresses for the StOp in stage 2 (SU2 412) of store unit 153 and selectively asserts a hold signal (SU2_Hold) to SU2 412 under conditions now described An older LdOp in stage 1 (or in an earlier stage) causes store hold logic 413 to unconditionally hold the current StOp in stage 2 of store unit 153 On the other hand, an older LdOp in stage 2 holds the current StOp only if there is also a match between the memory addresses for the StOp in stage 2 and older LdOp The following RTL describes the design and operation of store hold logic 413 //SU2 Hold Logic, // ************* ( . // SU2 Partial Address Match with LU pipe Stage 2, AddrMatch2 = (LU2_PageOffset (9,3) == LinAddr(9,3) ) && (LU2_ByteMark & ByteMark) &£< ! (LU2_SpecMem * SU2_SpecMem) , // Hold (SU2 needs to Hold) , // Note that Load Validity is taken into account m the LUnOlder // signals; SU2_Hold = StV && (SC_LU201der && (AddrMatch2 | | DTB_SUCacheDιs | | LU2_SMO) | | SC_LU101der) | | SUViol; Store hold logic 413 supplies the SU2_Hold signal to SU2 412 to inhibit execution of a stage 2 StOp when any of the above-specified combinations of partial address matches (AddrMatch2) and relative age indications (SC_LU20LDER and SC_LU10LDER) from scheduler 180 are present A younger StOp in stage 2 is unconditionally held up for an older stage I (or eariier) LdOp As the older LdOp advances to stage 2. a partial address mismatch may establish that no ordering constraints are violated by out-of-order completion of the younger StOp and older LdOp and store hold logic 413 will release the hold in accordance with the SU2_Hold equation As with load hold logic 403, store hold logic 413 performs partial address matching based on the lower portions (l e , LinAddr ( 9 , 3 ) and LU2_PageOf f set ( 9 , 3 ) ) of linear addresses for StOp and LdOps Byte marks (ByteMark and LU2_ByteMark) are also included in the partial address match In the exemplary embodiment, store hold logic 413. like load hold logic 403, is over-inclusive in the set of conditions which trigger a hold However, the design of store hold logic 413 is even more over-inclusive than load hold logic 403 For example, store hold logic 413 holds a younger stage 2 StOp for an older stage 1 LdOp checking for an address match Altemative embodiments may more precisely (or less precisely) delimit the set of conditions which trigger a hold in store hold logic 413 and/or store hold logic 413 In the exemplary embodiment however, store hold logic 413 less precisely delimits hold conditions based on an estimate that in a typical instruction profile LdOps will more often be dependent on StOps than vice versa Referring to FIGURE 4. store hold logic 413 receives indications of the relative age of the LdOp in SU2 412 of store unit 153 from store ordering logic 434b In particular, store hold logic 413 receives an SC_LU20LDER indication and an SC_LU10LDER indication from respective scan chains (LU2 older scan chain 434b.l and LU I older scan chain 434b.2) of store ordering logic 434b Store hold logic 413 also receives partial address signals for the LdOps in the LU2 402 stage of load unit 152 and for the StOp in SU2 412 of store unit 153 Based on these inputs, store hold logic 413 selectively asserts a hold signal (SU2_Hold) stalling the StOp in SU2 412 (and also subsequent StOps) in accordance with the above RTL description StOps (including Ops, operands, displacement values, and certain control signals) arrive at SU I 411 via respective busses and lines illustratively shown as collective bus 189 Memory addresses and store operands for StOps in SU2 412 are provided to store queue 159 when SU2_Hold is unasserted (or released) In turn, store queue 159 writes store operands to the address space via data cache 170 Both stages of store unit 153 (SU I 411 and SU2 412) communicate with the data TLB 171 and with other memory management data structures residing at various levels in the memory hierarchy (L l data cache 170, L2 cache 1 10. main memory, etc ) to resolve virtual (or linear) addresses to physical addresses Those skilled in the art will recognize a variety of suitable implementations of store hold logic 413 conforming with the above-described RTL Store hold logic 413 is any suitable implementation FIGURE 6 depicts one such suitable implementation in combinatorial logic Scheduler Logic including Scan Chains Scheduler 180 also provides support for maintaining a sufficient execution ordering between LdOps and StOps In the exemplary embodiment, this support is in the form of scan chains which supply relative age indications to load hold logic 403 and store hold logic 413 As described above, ordering is maintained by holding operations at stage 2 of the load and store pipelines (I e , at LU2 402 and SU2 412) Execution ordering is maintained for StOps which reference memory locations In the exemplary embodiment, no ordering is enforced for LEA StOps (Load Effective Address) which do not actually address memory, although CDA and CIA StOps (Check Data Effective Address and Check Instruction Effective Address) which generate faultable addresses are included in the ordering scheme to simplify circuit design No LdOps are excluded from the ordering scheme since all LdOps reference memory Alternative embodiments may include or exclude Ops such as LEA, CDA, and CIA StOps as appropriate Referring back to FIGURE 2. load-store ordering logic 234 in scheduler 180 provides indications of the relative age of LdStOps with respect to particular LdOps and StOps in stage 2 of respective load and store execution units Load-store ordering logic 234 accesses Type [2 0 ] fields 241 and State [ 3 0 ] fields 242 of each Op entry (illustratively of Op entry 240.1 ) in scheduling reservoir 240 and provides relative store age indications (e g , SC_SU20LDER, SC_SU10LDER. and SC_SU0OLDER) to load unit 152 and relative load age indications (e g , SC LU20LDER and SC LUIOLDER) to store unit 153 via lines collectively shown as 189.5 Referring now to FIGURE 4. load-store ordering logic 234 is shown as load ordering logic 434a and store ordering logic 434b portions For LdOps. load ordering logic 434a determines the relative age of the LdOp in LU I 401 with respect to the StOp (if any) in SU2 412, with respect to the StOp (if any) in SU I 411. and with respect to any other StOps in earlier stages of processing For StOps, store ordering logic 434b determines the relative age of the StOp in SU 1 411 with respect to the LdOp (if any) in LU2 402 and with respect to any other LdOps in eariier stages of processing FIGURE 4 depicts load ordering logic 434a including three component scan chains. SU2 older scan chain 434a.1. SUI older scan chain 434a.2, and SUO older scan chain 434a.3 Each component scan chain uses Type [2 : 0 ] fields 241 and State [ 3 . 0] fields 242 (not shown) of Op entries in scheduling reservoir 240 to supply respective relative age indications SU2 older scan chain 434a.1 supplies SC_SU20LDER. SU I older scan chain 434a.2 supplies SC_SU10LDER, and SUO older scan chain 434a.3 supplies SC_SU0OLDER The design of store ordering logic 434b is analogous to, but not symmetric with, load ordering logic 434a ln particular, store ordering logic 434b includes two component scan chains, LU2 older scan chain 434b.1 and LU I older scan chain 434b.2 As with load ordering logic 434a, each component scan chain of store ordering logic 434b uses Type [2 : 0] fields 241 and State [3 .0] fields 242 to supply respective relative age indications LU2 older scan chain 434b.l supplies SC_LU20LDER and LUI older scan chain 434b.2 supplies SC_LU10LDER Although shown as independent scan chains for puφoses of illustration, those skilled in the art will recognize that load ordering logic 434a and store ordering logic 434b may share logic, e g , Type [2 : 0] and State [ 3 0 ] detection circuitry, across component scan chains In the exemplary embodiment, the scan chains of load ordering logic 434a (i e , SU2 older scan chain 434a.1 , SU I older scan chain 434a.2. and SUO older scan chain 434a.3) include "propagate-kill" style scan chain logic which is a simplification over "generate-propagate-kill" carry- lookahead logic such as that used in high speed adders Scan chains of store ordering logic 434b (i e , LU2 older scan chain 434b.l and LU I older scan chain 434b.2) also include "propagate-kill" style scan chain logic Logic simplifications over traditional "generate- propagate-kill" carry lookahead techniques arise from the observation that generate (G) terms are zero and propagate (P) terms are the complement of associated kill (K) terms Load ordering logic 434a and store ordering logic 434b are now described with reference to FIGURE 4 During a first phase of stage 2 (for a LdStOp), scan chains of load ordering logic 434a and store ordering logic 434b perform propagate-kill" style scans (three for LdOps, two for StOps) across the entries of scheduler 180 from oldest to youngest During a second phase of stage 2, multiplexing logic samples the Cin signal corresponding to the stage 2 LdStOp and supplies a relative age indication to hold logic (403 or 413) Focusing illustratively on a single scan chain, SU2 older scan chain 434a.1 performs a propagate-kill" scan across the entries of scheduler 180 during the first phase of stage 2 Multiplexing logic 434a.4 samples from its associated scan chain (SU2 older scan chain 434a.1) the C n signal corresponding to the Op entry for a LdOp in LU2 402 Multiplexing logic 434a.4 then supplies the Cin as the SC_SU20lder signal to load hold logic 403 The design and operation of remaining scan chains of load ordering logic 434a are similar For example, SU I older scan chain 434a.2 scans the entries of scheduler 180 and associated multiplexing logic 434a.5 supplies the SC_SU101der signal to load hold logic 403 Similarly, SUO older scan chain 434a.3 scans the entries of scheduler 180 and associated multiplexing logic 434a.6 supplies the SC_SU0Older signal to load hold logic 403 The scan chains of store ordering logic 434b are analogous Focusing illustratively on a single scan chain, LU2 older scan chain 434b.1 performs a "propagate-kill" scan across the entries of scheduler 180 during the first phase of stage 2 Multiplexing logic 434b.4 samples from its associated scan chain (LU2 older scan chain 434b.1 ) the Cm signal corresponding to the Op entry for a StOp in SU2 412 Multiplexing logic 434b.4 then supplies the Cin as the sc_LU20lder signal to store hold logic 413 The design and operation of remaining scan chains of store ordering logic 434b are similar For example. LU I older scan chain 434b.2 scans the entries of scheduler 180 and associated multiplexing logic 434b.5 supplies the SC_LU101der signal to store hold logic 413 A stage 2 LdOp (or stage 1 LdOp performing the first half of a misaligned load) requires three scan chains since the LdOp's age relative to three categories of StOps must be determined Each scan chain of load ordering logic 434a scans for the first oldest StOp in one ofthe three categories The SU2 older scan chain 434a.1 detects a stage 2 StOp (or stage 1 StOp performing the first half of a misaligned store) The SUI older scan chain 434a.2 detects a stage I StOp, and SUO older scan chain 434a.3 detects a pre-stage 1 StOps The state of the "carry" signal, Cin. at any point in the scan chain reflects whether a StOp of relevant state (as encoded by State [ 3 : 0 ] of the corresponding Op entry in scheduler 180) has been encountered/found Thus, the Cin corresponding to an Op entry for a stage 2 LdOp provides the LdOp's age relative to StOps of the state detected by the particular scan chain If Cιn= ι. the carry signal was not "killed " as it "propagated" up the scan chain from older to younger Op entries and no older StOp of the particular state exists Based on these Cm indications, relative age indications (SC_SU201der, SC_SU101der, and SC_SU0Older) are supplied to load hold logic 403 which then determines which SU address comparator signals (AddrMatchl or AddrMatch2) to examine and, more generally, whether to hold up the stage 2 LdOp A stage 2 StOp (or stage 1 StOp performing the first half of a misaligned store) requires two scan chains since the StOp's age relative to two categories of LdOps must be determined Each scan chain of store ordering logic 434b scans for the first oldest LdOp in one of the two categories The LU2 older scan chain 434b.1 detects any stage 2 LdOp (or stage 1 LdOp performing the first half of a misaligned load) The LU 1 older scan chain 434b.2 detects any pre-stage 2 LdOps The state ofthe "carry" signal. Cm. at any point in the scan chain reflects whether a LdOp of relevant state (as encoded by State [ 3 0] of the corresponding Op entry in scheduler 180) has been encountered/found The Cin corresponding to an Op entry for a stage 2 StOp provides the StOp s age relative to LdOps of the state detected b\ the particular scan chain If Cm=l. the carry signal was not "'killed as it propagated up the scan chain from older to younger Op entries and no older LdOp of the particular state exists Based on these Cin indications, relative age indications (SC_LU201der and SC_LU101der) are supplied to store hold logic 413, which determines whether to examine the LU stage 2 address comparator (AddrMatch2) and whether to hold up the stage 2 StOp Each scan chain (I e , SU2 older scan chain 434a.1. SU I older scan chain 434a.2. SUO older scan chain 434a.3, LU2 older scan chain 434b.1, and LU I older scan chain 434b.2) is a "propagate-kill" chain from the oldest to youngest entry of scheduler 180 The following RTL describes each of the five scan chains in terms of lookahead equations The bit-level P/ terms are based only on the state [ 3 : 0 ] field (in particular, the Sl. S2, and S3 bits) and Type [2 : 0 ] field (ST or LU) of an entry For the three LdOp scan chains, the ST type bit is used instead of the SU bit This distinguishes the StOps which actually reference memory from LEA operations which only generate logical addresses The RTL which follows describes the operation of load ordering logic 434a and store ordering logic 434b, including multiplexing logic (434a.4. 434a.5. 434a.6. 434b,4. and 434b.5) and scan chains (434a.1, 434a.2. 434a.3, 434b.1. and 434b.2) In particular, Op entry equations labeled LUst2, LUstl. and LUstO denote the P and K terms corresponding to each Op entry for the scan chains respectively enumerated above as SU2 older scan chain 434a.1, SU I older scan chain 434a.2, and SUO older scan chain 434a.3 Similarly, Op entry equations labeled SUld2 and SUldl denote the P and K. terms corresponding to each Op entry for the scan chains respectively enumerated above as LU2 older scan chain 434b.1 and LU I older scan chain 434b.2 Bit-level or Op Entry equations LUst2 -P=K = ST -S3 (S2 + Sl SU2_FιrstAddrV) LUstl -P=K = ST -S2 LUstO -P=K = ST -Sl SUld2 -P=K = LU -S3 (S2 + Sl LU2_FιrstAddrV) SUldl -P=K = LU ~S2 In the exemplary embodiment, (S2 + Sl SU2_FιrstAddrV) and ( S2 + Sl LU2_FιrstAddrV) terms extend the Op entry equations to handle stalling of stage 1 LdStOps performing the first half of a misaligned memory access) The scan chains of load ordering logic 434a and store ordering logic 434b are organized as carry- lookahead logic which are descπbed by the following bit and group lookahead equations Group lookahead equations (based on four-bit groups) Pgrp = P0 Pl P2 P3 CInO = Cin // note: Op 0 is oldest Op within a quad CIn2 = Cm P0 Pl CIn3 = C P0 Pl P2 Lookahead amongQuads CmGrp5 = 1 // note. Quad 5 is oldest quad CιnGrp4 = Pgrp5 CmGrp3 = Pgrp5 Pgrp4 CmGrp2 = Pgrp5 Pgrp4 Pgrp3 CinGrpl = Pgrp5 Pgrp4 Pgrp3 Pgrp2 C GrpO = Pgrp5 Pgrp4 Pgrp3 Pgrp2 Pgrpl wherein groups are four-bit groups Those skilled in the art will recognize a variety of suitable implementations of scan chains including implementations using different group configurations Relative age determinations can be accelerated by using tree structured lookahead logic FIGURES 7A and 7B depict one such design based on 3-bιt groups FIGURE 7A depicts an AND-tree 710 for generating seven ofthe eight group "carry in" signals, CmGrpO, CinGrpl, CmGrp2, CmGrp3, CmGrp4, CmGrp5, and CmGrp6, from the P (propagate) terms associated with each ofthe 24 Op entries of scheduler 180 The eighth "carry in" signal. CmGrp7, is a logical 1 In the embodiment of FIGURE 7A, the first two levels of gates are shown as NAND and NOR gates, whereas subsequent levels are AND gates Altemate embodiments may implement the canonical AND tree using AND gates, alternating levels of NAND and NOR gates, or combinations thereof Signal rise times can be improved (along the generally longer lines connecting the later levels of gates) by implementing the later levels ofthe canonical AND tree as NAND-mverter pairs Preferably, additional gate delays (e g , the back-to-back inverters shown in FIGURE 7A) are provided along signal paths, such as the CmGrp3, CιnGrp4, CinGrpδ, and CmGrp6 signal paths In this way, fanout in the AND-tree can be limited to two (2), thereby improving the critical path timing characteristics ofthe AND-tree as compared with implementations having larger fanouts at certain gates Implementations of scan chains 434a.1, 434a.2, 434a.3, 434b.1, and 434b.2 based on the logic of FIGURES 7A and 7B are analogous, though the nature ofthe P terms associated with each (e g , PO, Pl, P2. P23) differs as described above with respect to the Op entry equations Returning now to the more generalized, RTL description of the scan chains of load ordering logic 434a (I e , the scan chains defined above by the LUst2, LUstl, and LUstO equations), the Cm values corresponding to each Op entry (e g., the twenty-four LUst2cha . CIN values of the scan chain having entries defined above by the LUst2 equation, the twenty-four LUstlchain . CIN values ofthe scan chain having entries defined above by the Lustl equation, and the twenty-four LUstOchain . CIN values of the scan chain having entries defined above by the LustO equation) are combined in accordance with the following RTL LUAges [2 : 0 ] = 3 ' O SUAges [ l : 0] = 2 ' bO for (all Ops) { LUAges[2:0] |= (LU -S3 (S2 + Sl LU2_FιrstAddrV) ) ? {-LUst2cham.CIN, -LUstlchain.CIN, -LUstOchain.CIN} : 3'bO SUAges[l:0] |= (SU -S3 (S2 + Sl SU2_FιrstAddrV) ) ? { -SUld2cham . CIN , -SUldlchain CIN} 2 ' bO } Focusing on the load ordering logic 434a definition, the three signals LUAges [2 . 0] , are outputs of multiplexing logic 434a.4. multiplexing logic 434a.5. and multiplexing logic 434a.6. receptively The (LU -S3 ( S2 + Sl LU2_FιrstAddrV) term represents multiplexer selection logic selecting the particular Cm value corresponding to a stage 2 LdOp (or stage 1 LdOp performing the first half of a misaligned load) Store ordering logic 434b is similar For each of the two scan chains of store ordering logic 434b. the Cm values corresponding to each Op entry (1 e , the twenty-four SUld2chaιn . CIN values of the scan chain having entries defined above by the SUld2 equation and the twenty-four SUldlchain . CIN values of the scan chain having entries defined above by the SUldl equation) are combined with 24 1 multiplexing logic defined also by the above RTL Signals SUAges [ l : 0 ] , are outputs of multiplexing logic 434b.4 and multiplexing logic 434b.5, receptively The ( SU -S3 ( S2 + Sl SU2_FιrstAddrV) term represents multiplexer selection logic selecting the particular Cm value corresponding to a stage 2 StOp (or stage 1 StOp performing the first half of a misaligned store) The carry signals selected by multiplexing logic 434a.4, 434a.5. and 434a.6 are inverted and are respectively supplied to load hold logic 403 as SC_SU201der, SC_SU101der, and SC_SU0Older Similarly, carry signals selected by multiplexing logic 434b.4 and 434b.5 are inverted and are respectively supplied to store hold logic 413 as SC_LU20lder and SC_SU101der Those skilled in the are will recognize a variety of suitable implementations for multiplexing logic FIGURE 7B depicts a design for multiplexing logic 434a.4. 434a.5, 434a.6. 434b.4 and 434b.5 which provides accelerated generation of the respective LUAges [2 : 0] and LUAges [ 2 0 ] signals using group carry-in signals (CmGrpO, CinGrpl, CmGrp2, CmGrp3, CιnGrp4, CmGrpS, CinGrpβ, and CιnGrp7) from the AND tree of FIGURE 7A For implementations of each scan chain (l e.. SC_SU201der, SC_SU10lder, ΞC_SU0Older, SC_LU20lder and SC_SU101der), signals associated with groups of three Op entries are combined in eight parallel logic blocks, illustratively logic block 720, and the eight resulting signals are combined in a two level OR structure (not shown) to provide the associated Ages signal Each of the eight logic blocks can be implemented using three gates (I e , NOR gate 723 and the pair of complex gates 721 and 722) Significantly, only a single gate delay (I e . that associated with complex gate 722) is included in the critical path for providing the associated Ages signal In logic block 720. the CmGrpO input is the group 0 carry-in signal from FIGURE 7A, the P [0] , P [l] , and P [2] inputs represent the Op entry level propagate terms associated with a given group of three and the SEL [ 0 ] . SEL [ 1] , and SEL [ 2 ] terms are the associated Op entry selection terms The seven remaining parallel logic blocks (not shown) are similar, receiving respective ones of the group carry-in signals. Op entry level propagate terms, and Op entry selection terms as inputs Implementations of multiplexing logic 434a.5 434a.6 434b.4 and 434b.5 based on the logic of FIGURE 7B are analogous, though the nature ofthe P [N] terms associated with each differs as descπbed above with respect to the Op entry RTL equations Additionally, the nature of the SEL [N] terms differs depending on whether the scan chain is for identifying StOps older than a stage 2 LdOp or for identifying LdOps older than a stage 2 StOp The SEL [N] inputs to the complex gates are provided by logic implementing the selection terms described above with reference to the above RTL, l e , (LU -S3 ( S2 + Sl LU2_FιrstAddrV) for the LUxOlder scan chains and ( SU -S3 ( S2 + Sl SU2_F rstAddrV) for the SUxOlder scan chains While the invention has been described with reference to various embodiments, it will be understood that these embodiments are illustrative and that the scope of the invention is not limited to them Many variations, modifications, additions, and improvements of the embodiments described are possible For example, the organization of Op entries in scheduler 180 as Op quads is merely illustrative Altemative embodiments may incoφorate other structures and/or methods for representing the nature and state of operations in a computer having multiple and/or pipelined execution units Furthermore, alternative embodiments may incoφorate different hierarchies of memories and caches, for example L l and L2 caches Alternative embodiments may provide for a different distribution of structures and functionality within the load unit 152 and the store unit 153 For example, the load unit 152 and the store unit 153 may be independently modified to include larger or smaller numbers of execution stages Structures for address comparison may be distributed differently between the load unit 152 and the store unit 153 Furthermore, altemate embodiments may incoφorate larger or smaller numbers of scan chains for holding LdOps and StOps Address comparison may be eliminated in favor of a more conservative hold policy Additionally, structures and functionality presented as hardware in the exemplary embodiment may be implemented as software, firmware, or microcode in alternative embodiments A wide variety of computer system configurations are envisioned, each embodying out-of-order load/store execution control in accordance with the present invention For example, such a computer system (e g , computer system 1000) includes a processor 100 providing out-of-order load/store execution control in accordance with the present invention, a memory subsystem (e g , RAM 1020), a display adapter 1010, disk controller/adapter 1030, various mput/output interfaces and adapters (e g , parallel interface 1009, serial interface 1008, LAN adapter 1007, etc ), and corresponding extemal devices (e g , display device 1001, printer 1002, modem 1003, keyboard 1006, and data storage) Data storage includes such devices as hard disk 1032, floppy disk 1031, a tape unit, a CD-ROM. a jukebox, a redundant array of inexpensive disks (RAID), a flash memory, etc These and other variations, modifications, additions, and improvements may fall within the scope of the invention as defined in the claims which follow

Claims: WE CLAIM: 1 In a processor having a load unit and a store unit, a load/store execution controller for allowing load and store instmctions to execute generally out-of-order with respect to each other while enforcing data dependencies between the load and store instructions, the load/store execution controller comprising an age ordered array of scheduler operation entries, each scheduler operation entry indicative of a corresponding operation in an operation sequence, load hold logic coupled to the load unit to selectively inhibit execution of a load operation in the load unit upon receipt of a store older indication, and scan chain logic coupled to the operation entries and to the load hold logic, the scan chain logic supplying store older indications indicating the presence of an older store operation relative to a load operation in the load unit 2 In a processor having a load unit and a store unit, a load/store execution controller for allowing load and store instructions to execute generally out-of-order with respect to each other while enforcing data dependencies between the load and store instmctions, the load/store execution controller compπsing an age ordered array of scheduler operation entries, each scheduler operation entry indicative of a corresponding operation in an operation sequence, store hold logic coupled to the store unit to selectively inhibit execution of a store operation in the store unit upon receipt of a load older indication, and scan chain logic coupled to the operation entries and to the store hold logic, the scan chain logic supplying load older indications indicating the presence of an older load operation relative to a store operation in the store unit 3 A load/store execution controller, as recited in either claim 1 or 2, wherein the scheduler operation entries include operation type and operation state fields, and wherein the scan chain logic is coupled to receive the operand type and operand state fields 4 A load store execution controller, as recited in claim 3, wherein the store older indications include first and second store older indications, the first store older indication indicating the presence of an older store operation in a preliminary stage of store operation evaluation, the second store older indication indicating the presence of an older store operation in a first execution stage of store operation evaluation, the scan chain logic differentiating between stages of store operation evaluation with the operation state fields 5 A load/store execution controller, as recited in claim 4, wherein the store older indications further include a third store older indication indicating the presence of aπ older store operation in a second execution stage of store operation evaluation 6 A load/store execution controller, as recited in claim 4. wherein the load hold logic comprises first address match logic coupled to the store unit to receive a first store target address corresponding to a store operation in the first execution stage of store operation evaluation, the first address match logic matching the first store target address against the target address for the load operation, wherein the load hold logic inhibits execution ofthe load operation in response to the first store older indication, and wherein the load hold logic inhibits execution ofthe load operation in response to the second store older indication when the first address match logic indicates a match between the first store target address and the target address for the load operation 7 A load store execution controller, as recited in claim 5. wherein the load hold logic comprises first address match logic coupled to the store unit to receive a first store target address corresponding to a store operation in the first execution stage of store operation evaluation, the first address match logic matching the first store target address against the target address for the load operation, and second address match logic coupled to the store unit to receive a second store target address corresponding to a store operation in the second execution stage of store operation evaluation, the second address match logic matching the second store target address against the target address for the load operation, wherein the load hold logic inhibits execution o the load operation in response to the first store older indication, wherein the load hold logic inhibits execution ofthe load operation in response to the second store older indication when the first address match logic indicates a match between the first store target address and the target address for the load operation, and wherein the load hold logic inhibits execution of the load operation in response to the third store older indication when the second address match logic indicates a match between the second store target address and the target address for the load operation 8 A load/store execution controller, as recited in claim 6, wherein the first address match logic performs a partial address match, matching only a subset of the bits of the first store target address against corresponding bits for the target address ofthe load operation 9 A load/store execution controller, as recited in claim 4, wherein the scan chain logic comprises a first propagate-kill scan chain from older to younger ones ofthe scheduler operation entries, the first propagate-kill scan chain supplying the first store older indication when the state and type fields of the scheduler operation entries indicate a store operation in the preliminary stage of store operation evaluation older than the load operation in the load unit: and a second propagate-kill scan chain from older to younger ones ofthe scheduler operation entries, the second propagate-kill scan chain supplying the second store older indication when the state and type fields ofthe scheduler operation entries indicate a store operation in the first execution stage of store operation evaluation older than the load operation in the load unit 10 A load/store execution controller as recited in claim 5, wherein the scan chain logic comprises a first propagate-kill scan chain from older to younger ones of the scheduler operation entries the first propagate-kill scan chain supplying the first store older indication when the state and type fields ofthe scheduler operation entries indicate a store operation in the preliminary stage of store operation evaluation older than the load operation in the load unit, a second propagate-kill scan chain from older to younger ones ofthe scheduler operation entries, the second propagate-kill scan chain supplying the second store older indication when the state and type fields of the scheduler operation entries indicate a store operation in the first execution stage of store operation evaluation older than the load operation in the load unit, and a third propagate-kill scan chain from older to younger ones of the scheduler operation entries, the third propagate-kill scan chain supplying the third store older indication when the state and type fields ofthe scheduler operation entries indicate a store operation in the second execution stage of store operation evaluation older than the load operation in the load unit 1 1 A load store execution controller, as recited in claim 1 , wherein the scan chain logic comprises a first propagate-kill scan chain from older to younger ones ofthe scheduler operation entries, the first propagate-kill scan chain supplying the first store older indication in response to the presence of a store operation in a scheduler operation entry older than a scheduler operation entry associated with the load operation, operation entry level propagate and kill terms of the first propagate-kill scan chain being functions of the state and type fields of scheduler operation entries 12 A load store execution controller, as recited in claim 1 , wherein the scan chain logic comprises an AND-tree of operation entry level propagate signals, the AND-tree supplying a plurality of carry-in signals in response to the operation entry level propagate signals, the operation entry level propagate signals being functions ofthe operand type and operand state fields ofthe corresponding scheduler operation entry, and multiplexing logic coupled to the AND-tree to receive the carry-in signals, the multiplexing logic selective for a particular one of the carry-in signals corresponding to a scheduler operation entry associated with the load operation in the load unit 13 A load/store execution controller, as recited in claim 12 wherein the AND-tree supplies a plurality of group carry-in signals in response to the operation entry level propagate signals, the group carry-in signals corresponding to a group of scheduler operation entries, and wherein the multiplexing logic comprises group logic blocks each responsive to a first conjunction between the corresponding group carry- in signal and any ot a plurality of selection signals indicating the presence of the load operation within the group of scheduler operation entries, each of the group logic blocks also responsive to a second conjunction between one operation entry level propagate signals and a corresponding one ofthe selection signals, and an OR-structure coupled to each of the group logic blocks and supplying one ofthe store older indications 14 Scan chain logic for allowing load and store instmctions to execute generally out-of-order with respect to each other while enforcing data dependencies between the load and store instmctions. the scan chain logic comprising an AND-tree of propagate signals, the AND-tree supplying a plurality of carry-in signals in response to propagate signals, wherein the propagate signals are functions of operand type and operand state indications from corresponding entries in a scheduler array, and multiplexing logic coupled to the AND-tree to receive the carry-in signals, the multiplexing logic selective for a particular one of the carry-in signals corresponding to a load/store entry in the scheduler array 15 Scan chain logic, as recited in claim 14 wherein the load/store entry is associated with a load operation and the propagate signals are indicative of the presence, in a corresponding entry ofthe scheduler array, ofthe load operation, wherein the AND-tree supplies a plurality of group carry-in signals in response to the propagate signals, the group carry-in signals corresponding to a group of entries in the scheduler array, and wherein the multiplexing logic comprises group logic blocks each responsive to a first conjunction between the corresponding group carry- "»ιn signal and any of a plurality of selection signals indicating the presence ofthe load operation within the group of entries in the scheduler array, each of the group logic blocks also responsive to a second conjunction between one ofthe propagate signals and a corresponding one of the selection signals, and an OR-structure coupled to each of the group logic blocks and supplying a store older indication indicating the presence, in the scheduler array, of at least one store operation older than the load operation 16 Scan chain logic, as recited in claim 14 wherein the load/store entry is associated with a store operation and the propagate signals are indicative of the presence, in a corresponding entry of the scheduler array, of the store operation. wherein the AND-tree supplies a plurality of group carry-in signals in response to the propagate signals the group carry-in signals corresponding to a group of entries in the scheduler array, and wherein the multiplexing logic comprises group logic blocks each responsive to a first conjunction between the corresponding group carry- in signal and any of a plurality of selection signals indicating the presence of the store operation within the group of entries in the scheduler array, each of the group logic blocks also responsive to a second conjunction between one of the propagate signals and a corresponding one ofthe selection signals, and an OR-structure coupled to each of the group logic blocks and supplying a load older indication indicating the presence, in the scheduler array, of at least one load operation older than the store operation 17 Scan chain logic, as recited in claim 14, wherein the AND-tree includes earlier and later stages, the earlier stages implemented as alternating stages of NAND and NOR gates and the later stages implemented as NAND-inverter pairs wherein the inverters are spaced to improve the signal rise time characteristics along generally longer lines connecting the later stages 18 Scan chain logic, as recited in claim 14, wherein the AND-tree includes delay elements along certain of the carry-in signal paths to substantially equalize aggregate delays along all of the carry-in signal paths 19 The load store execution controller of claim I in a processor subsystem of a computer system, the computer system comprising, in addition to the processor subsystem, a memory subsystem coupled to the load and store units ofthe processor 20 In a processor having a load unit and a store unit, a load/store execution controller for allowing load and store instmctions to execute generally out-of-order with respect to each other while enforcing data dependencies between the load and store instmctions, the load store execution controller characterized in that the load/store execution controller comprises. an age ordered array of scheduler operation entries, each scheduler operation entry indicative of a corresponding operation in an operation sequence, one of load hold logic and store hold logic coupled to a respective one ofthe load unit and the store unit to selectively inhibit execution of a respective one of a load operation in the load unit and a store operation in the store unit upon receipt of a respective one of a store older indication and a load older indication; and scan chain logic coupled to the operation entries and to one of the load hold logic and the store hold logic, the scan chain logic supplying the respective one ofthe store older indication and the load older indication, respectively indicating presence of an older one of a store operation and a load operation relative to the respective one ofthe load operation in the load unit and the store operation in the store unit

Inventors: BEN-MEIR AMOS, FAVOR JOHN G, ROBERTS MARK E, STAPLETON WARREN G, TRULL JEFFREY E, BEN-MEIR, AMOS, FAVOR, JOHN, G., ROBERTS, MARK, E., STAPLETON, WARREN, G., TRULL, JEFFREY, E.
Applicants: ADVANCED MICRO DEVICES INC, ADVANCED MICRO DEVICES, INC.
Application year: 1996
Main classification: G06F9
IPC codes: G06F9