A Memory access device

Abstract: A memory access device comprises: a memory unit having a plurality of independently accessible banks; a pipeline stage number setting unit for setting the number of the pipeline stages in a pipeline operation for accessing the next-to-be-accessed one of the plurality of independently accessible banks before completing an access to a currently accessed one of the plurality of independently accessible banks, so that banks whose number is not more than the number of the plurality of banks are accessed; a unit for generating an address of the next-to-be-accessed one of the plurality of independently accessible banks and for switching a bank from the currently used one of the plurality of independently accessible banks to the next-to-be-accessed one of the plurality of independently accessible banks in accordance with the number of the pipeline stages set by the pipeline stage number setting unit.

Description: Background of the Invention Field of the Invention This invention pertains to a memory access device, and more particularly to an access device for parallelly accessing a plurality of banks split from an address space. To improve the processing speed of a computer system, it is effective to insert a memory (called a cache memory) operating at a super-high speed, is between the main memory and the computer. The average access time to the computer is expedited commensurate with the access time of the cache memory. However, because the capacity of a cache memory is smaller than that of a main memory, there are often cases in which targeted data do not exist (mis-hits) in the cache memory. A mis-hit requires that the content of the cache memory is updated by the content of the main memory. This lowers the computer operating speed commensurately with the access speed of the main memory. Description of the Related Arts The following countermeasures can be considered: (1) Increase the capacity of a cache memory. (2) Raise the hit ratio by modifying the caching algorithm. (3) Use a cache memory comprising a high speed/high performance element (e.g. an SRAM). However, (1) is limited by system cost, (2) can reduce miss-hits but cannot completely eliminate them, and (3) raises system cost in proportion to the capacity of the main memory. Hence, these methods have proved to be largely ineffective. Figure 1 is a timing chart showing an example of a bus cycle of a microprocessor. CLK indicates a clock signal, ADDRESS indicates read or write address data outputted from a microprocessor to a bus, BS# indicates the control signal indicating the start of a bus cycle (for latching address data obtained from logic of this signal and CLK), DATA indicates read (write) data, DC# indicates a signal showing the effectiveness of read data (or completion of writing write data). Here, # indicates a negative logic. In this example, one [1] cycle (a basic cycle) is set to two [2] clock (T 1 and T 2 ) durations. This is for preventing data in a read cycle from colliding with data in a write cycle on a bus (i.e., a bus conflict). That is, the basic cycle comprising two [2] clock durations enables a series of operations to be executed in which a read (or write) address is sent to a bus and a read (or write) address is latched at a change timing of BS# and read (or write) data are read (written). Although a cache memory is an example of a memory capable of reading and writing in such a high-speed basic cycle, a generic main memory operates more slowly than this. Figure 2 shows an exemplary main memory completing a read (or write) cycle in four [4] clock durations. Figure 2 does not show a cache memory for explanatory convenience. Figure 3 is a timing chart showing read and write operations with the configuration shown in Figure 2. Although a basic cycle of a microprocessor is completed in two [2] clock durations (T 1 and T 2 ), because the basic cycle of a main memory requires four [4] clock durations, two [2] clock durations of wait cycles (T 2 a and T 2 b) occur. Because the wait cycles interrupt a microprocessor operation, the speed cannot be raised. Figure 4 schematically shows a prior art example for solving this problem. In this example, the address space of a main memory is split into a plurality of divisions, and each division (called a bank) is used. Here, a bank has a W X D address space, where W corresponds to a block length having a predetermined data width (e.g. sixty-four [64] bits or thirty-two [32] bits), D corresponds to a block number, and an address of a block positioned at a height the same as that of a neighboring bank is sequential. That is, by sequencing from the address in the least significant bit (LSB) to that in the most significant bit (MSB) for the main memory of two [2] such banks, an access is made sequentially from the LSB block of BANK 0 → the LSB block of BANK 1 → the next bit block of BANK 0 → the next bit block of BANK 1 → the next bit block of BANK 0 → the next bit block of BANK 1 → ···· the MSB block of BANK 0 → the MSB block of BANK 1 . Figure 5 is a bus timing chart of the pipelines shown in Figure 4. Use of a main memory split into banks enables a "pipeline" operation to be performed as follows. In Figure 5, by repeatedly outputting address data (BANK 0 address) designating a desired address in BANK 0 and address data (BANK 1 address) designating a desired address in BANK 1 alternately for each of the basic cycles C 1 , C 2 , C 3 , ......, after the elapse of a number of cycles (number of prefetched address) produced by subtracting one [1] basic cycle from a total bank number, i.e. after basic cycle C 2 , read (or write) data can be apparently obtained in each basic cycle. Therefore, read data corresponding to the address of a basic cycle C i (where i = 1, 2, ....) can be obtained in the next basic cycle C i+1 , and the operation of outputting address data and the operation of reading read data (or writing write data) can be parallelly executed. As a result, a pipeline operation comprising a number of stages equal to the bank number is made possible, thereby enabling a main memory inferior in speed to a cache memory to be used as expeditiously as a cache memory. However, such a conventional memory access device has a configuration such that the number of prefetched addresses is determined from a bank number and an address pipeline having an equal stage number (e.g., a four [4] stage pipeline for a bank number four [4]) is executed. Thus, it has the problem that an address pipeline fails to be executed due to successive accesses to the same bank [1] when an address is created by a stride value or [2] when an address is created by an indirect address. Generally, a scientific or technical calculation program often performs the same operations for a large number of data elements. The following vector processing routine shows a typical example, which is described in a FORTRAN expression. STEP 001 DO LABEL I=1, 100 STEP 002 C(I)=A(I)+B(I) STEP 003 F(I)=D(I)*E(I) STEP 004 LABEL CONTINUE This is to continue the DO loop from STEP 001 to STEP 004 in the range of I (which is 1 through 100). While the value of I is updated, the operations C(I)=A(I)+B(I) F(I)=D(I)*E(I) are executed. For instance, the first operations are C(1)=A(1)+B(1) F(1)=D(1)*E(1) and the one-hundredth operations are C(100)=A(100)+B(100) F(100)=D(100)*E(100). Here, it takes an extremely large number of operands, such as A(1) through A(100), B(1) through B(100), D(1) through D(100), and E(1) through E(100), to conclude the DO loop in this example. Therefore, an effective address creation is necessary to access these operands. The operand creation system such as [1] or [2] described earlier is an art preferred for numerous operand accesses. {1} An address creation system by a stride value Figure 6 is a conceptual view of a prior art consecutive operand array. Figure 7 is a conceptual view of a prior art operand array having equal intervals. This is a creation system in which the distance from a preceding outputted address is expressed by a value alpha (called a stride value) which is integer times of an operand length L (a predetermined address width, e.g., thirty-two [32] bits or sixty-four [64] bits, also referred to as an operand unit). For instance, this corresponds to the "successive operand array" shown in Figure 6 when alpha=1. That is, plural operands 0 through 4 succeeding from a benchmark of a base address are successively accessed from operand 0, then operand 1, .... by sequentially generated addresses having a stride value "one [1]". When alpha=n (where n≠±1), this corresponds to an "equal interval operand array" shown in Figure 7. That is, plural operands 0 through 2 succeeding in equal intervals from a benchmark of a base address are successively accessed from operand 0, then operand 1, .... by sequentially generated addresses having a stride value "[n]". {2} An address creation system by an indirect address Figure 8 is a conceptual view of a prior art indirect operand array. This is a creation system in which the distance from a base address (called an offset value in this system) is expressed as an integer times an operand L. While the former system has a common stride value for all operands, this one has an offset value specific to each operand. In Figure 8, VR indicates an offset register. VR stores offset values "zero [0]" through "three [3]" for each operand to be accessed. Operand 0 is accessed based on the content of offset 0. Operand 1 is accessed based on the content of offset 1. These operations are repeated, thereby performing a memory access to an "indirect address array". An offset value changes dynamically during an address creation. However, when an address is created by these systems such that the bank number of addresses are indexed, there are cases in which a pipeline interference (consecutive access to the same bank) may take place when the next condition is satisfied, for instance, when a bank width is equal to an operand unit while a bank number is equal to a stride value. Figure 9 is a diagram showing an access state where the prior art operand unit and bank width are both sixty-four [64] bits and the bank number and stride values are both four [4]. Figure 10A shows access states in which both the operand unit and the bank width are sixty-four [64] bits and when both the bank number and the stride values are two [2]. The hatching part shows operands to be accessed (op1, op2, op3), which belong to the same bank (BANK 0 ). Figures 10A and 10B are diagrams showing access states where the prior art operand unit and bank width are both sixty-four [64] bits and the bank number and stride values are both two [2]. Therefore, because an address prefetching invites an address interference among op1, op2 and op3, there is a disadvantage that a normal pipeline operation cannot be performed in either the case shown in Figure 9 or that shown in Figure 10A. Figure 10B shows a case in which the operand unit (thirty-two [32] bits) is different from that (sixty-four [64] bits) shown in Figure 10A. Because op0, op2 and op3 can be accessed by switching banks, there is no such interference. Thus, this invention aims at preventing a pipeline operational inconvenience from occurring by avoiding an address interference through flexibly setting a pipeline stage number irrespective of a physical bank number. WO-A-90/01740 discloses a memory access device which rearranges data in a memory divided into a plurality of banks, the number of banks being variable. This memory access device prevents a conflict between banks by moving and rearranging data in a memory divided into a plurality of banks, and accesses the memory based on a stride. However, according to this prior art, data stored in the memory are rearranged, and control is not performed such that fetched addresses are generated based on the number of banks and a stride value. It is troublesome to rearrange data when all data are simultaneously stored as taught by WO-A-90/01740. According to the present invention, there is provided a memory access device for accessing a memory means having a plurality n of independently accessible banks, the device comprising: a pipeline stage number setting means arranged to set the number of pipeline stages in a pipeline operation for accessing a next-to-be-used one of said banks, before completing an access to a currrently-used one of said banks, so that not more than n banks are accessed; and a means for generating an address of said next-to-be-used bank and means for switching a bank from said currently-used bank to said next-to-be-used bank in accordance with said number of pipeline stages set by said pipeline stage number setting means; wherein: said pipeline stage number setting means is arranged to set said number of stages related to a command execution based on a stride value and said number n of banks in said memory means; and said address generating means is arranged to generate an operand address pertinent to said command execution in said number of pipeline stages set by said pipeline stage number setting means. This invention aims at preventing a pipeline operational inconvenience from occurring by avoiding an address interference through flexibly setting a pipeline stage number irrespective of a physical bank number. The address spaces of a main memory are partitioned in equal intervals of a predetermined data width. n banks are configured by addresses connecting the partitioned blocks. The banks store operands each having a length of the predetermined data width or a length of half the predetermined data width. Data accesses are executed in a pipeline form in a distance corresponding to an integer times the length of the operand. The memory access device comprises a pipeline stage number setting means for setting the pipeline stage number based on the operand length, the predetermined data width, the value of an integer times and the number of banks. Brief Description of the Drawings One skilled in the art can easily understand additional features and objects of this invention from the description of the preferred embodiments and the attached drawings. In the drawings: Figure 1 is a bus timing chart in which the basic cycle of a prior art system comprises two [2] clock durations; Figure 2 is a diagram showing a connection between a conventional microprocessor with its basic cycle being two [2] clock durations and a memory device operating in four [4] clock durations; Figure 3 is a timing chart for the bus shown in Figure 2; Figure 4 is a block diagram of a conventional pipeline; Figure 5 is a timing chart for the bus shown in Figure 4; Figure 6 is a conceptual view of a prior art consecutive operand array; Figure 7 is a conceptual view of a prior art operand array having equal intervals; Figure 8 is a conceptual view of a prior art indirect operand array; Figure 9 is a diagram showing an access state where the prior art operand unit and bank width are both sixty-four [64] bits and the bank number and stride values are both four [4]; Figures 10A and 10B are diagrams showing access states where the prior art operand unit and bank width are both sixty-four [64] bits and the bank number and stride values are both two [2]; Figure 11 is a block diagram of this invention; Figure 12 shows a conceptual structure of a bank number one [1] in an embodiment of this invention; Figure 13 shows a conceptual structure of a bank number two [2] in an embodiment of this invention; Figure 14 shows a conceptual structure of a bank number four [4] in an embodiment of this invention; Figure 15 is a diagram showing a bank number notification in an embodiment of this invention; Figure 16 is a diagram showing a pipeline stage number combination in case of sixty-four [64] bit operands; Figure 17 is a diagram showing a pipeline stage number combination in case of thirty-two [32] bit operands; Figure 18 is an access conceptual view in an embodiment of sixty-four [64] bit operands and bank number "one [1]"; Figure 19 is an access conceptual view in an embodiment of sixty-four [64] bit operands and bank number "two [2]"; Figure 20 is an access conceptual view in an embodiment of sixty-four [64] bit operands and bank number "four [4]"; Figure 21 is an access conceptual view in an embodiment of thirty-two [32] bit operands and bank number "one [1]"; Figure 22 is an access conceptual view in an embodiment of thirty-two [32] bit operands and bank number "two [2]"; Figure 23 is an access conceptual view in an embodiment of thirty-two [32] bit operands and bank number "four [4]"; Figure 24 is an access conceptual view in an embodiment of sixty-four [64] bit operands for an address creation system by an indirect value; Figure 25 is an access conceptual view in an embodiment of thirty-two [32] bit operands for an address creation system by an indirect value; Figure 26 is a block diagram of an address pipeline stage number setting circuit in an embodiment of this invention; Figure 27 is a conceptual view of a timing sequencer in an embodiment of this invention; Figure 28 is a block diagram of an address creation in an embodiment of this invention; Figure 29 is a conceptual view of an operand updating of an operand number register in an embodiment of this invention; Figure 30 is a timing chart for switching an output in an embodiment of this invention; Figure 31 is a conceptual view for generating a dummy DC# for an output switch timing in an embodiment of this invention; Figure 32 is a diagram of a system to which an embodiment is applied; Figure 33 is a functional block diagram of the microprocessor 30 shown in Figure 32; Figure 34 is a block diagram of the vector unit 61 shown in Figure 33; Figure 35 is a block diagram of the bus control unit 65 shown in Figure 33; Figure 36 is a block diagram of a scoreboard 87 in the control unit 63 shown in Figure 33; and Figure 37 is a block diagram of the pipeline control unit 88 shown in Figure 33. Description of the Preferred Embodiment Explanation of the Underlying Principle Figure 11 is a block diagram of this invention. As shown in Figure 11, to achieve the above object, this invention is characterized by the following memory access device. The address spaces of a main memory are partitioned in equal intervals of a predetermined data width. n banks are configured by addresses connecting the partitioned blocks. The banks store operands each having a length of the predetermined data width or a length of half the predetermined data width. Data accesses are executed in a pipeline form in a distance corresponding to an integer times the length of the operand. The memory access device comprises a pipeline stage number setting means for setting the pipeline stage number, based on the operand length, the predetermined data width, the value of an integer for maginification and the number of the banks. This invention prevents a pipeline operational inconvenience from occurring by avoiding an address interference through flexibly setting a pipeline stage number regardless of a physical bank number even in an address creation successively accessing the same bank. An embodiment of this invention is described by referring to the attached drawings. The principle of this embodiment is described as follows. Figures 12, 13 and 14 show exemplary pipelines in which the number of "physical" pipeline stages are "one [1]", "two [2]" and "four [4]" respectively. The bank numbers respectively correspond to the number of physical pipelines except when a predetermined condition is satisfied. That is, the configuration shown in Figure 12 illustrates a main memory comprising one [1] bank (BANK 0 ), the configuration shown in Figure 13 illustrates a main memory comprising two [2] banks (BANK 0 and BANK 1 ), and the configuration shown in Figure 14 illustrates a main memory comprising four [4] banks (BANK 0 , BANK 1 , BANK 2 and BANK 3 ). Each of these main memories is connected to a memory access device such as a microcontroller through a memory control circuit, an address bus and a data bus. A memory access device comprises external terminals T 0 and T 1 (may as well be bank number setting registers) for notifying a bank number, such that the bank number of a main memory can be notified from the outside. Figure 15 is a drawing showing the relation between a bank number and a setting of the external terminals T 0 and T 1 . By selectively connecting each of T 0 and T 1 to a high-voltage power source V H (V H corresponds to a logic 1) or a low voltage power source V L (V L corresponds to a logic 0), four [4] kinds of bank numbers (2 0 =bank number 1, 2 1 =bank number 2, 2 2 =bank number 4, and 2 3 =left as a reserve) are expressed in two [2] bit data. When an address creation system by a base address or a stride value is applied to a main memory, the earlier described inconvenience may arise. Accordingly, this embodiment causes an apparent bank number (hereafter referred to as a logic bank number) for a memory access device to be calculated from "a bank number of a main memory", "a stride value" and "an operand length", and the pipeline stage number corresponding to this logic bank number is set for each address creation system. {1} An address creation system by a stride value Figures 16 and 17 illustrate the set pipeline numbers in which operand lengths are sixty-four [64] bits and thirty-two [32] bits, respectively. The bank numbers (one [1], two [2] and four [4]) in Figures 16 and 17 are physical bank numbers on a main memory. The number of set pipeline stages corresponds to a logical bank number. The number of pipeline stages set for a sixty-four [64] bit operand is explained by referring to Figure 16. (1a) When a physical bank number is one [1], a virtual bank number is also one [1]. Therefore, the pipeline stage numbers are all set to one [1]. (1b) When a physical bank number is two [2], the pipeline stage number is set to either one [1] or two [2] according to the one [1] LSB of a stride value. More concretely, when the LSB is zero [0], one [1] stage is set; and when the LSB is one [1], two [2] stages are set. That is, one [1] stage is set when the stride value is even, and two [2] stages are set when the stride value is odd. (1c) When a physical bank number is four [4], the pipeline stage numbers are set to one [1], two [2] or four [4] stages according to the two [2] LSBs of a stride value. More concretely, when the LSBs are a "double zero [00]", one [1] stage is set; when the LSBs are "one zero [10]", two [2] stages are set; and at all other times, i.e., when the LSBs are "zero one [01]" or "double one [11]", four [4] stages are set. The number of pipeline stage numbers set for a thirty-two [32] bit operand is explained by referring to Figure 17. (2a) When a physical bank number is one [1], a virtual bank number is also one [1]. Therefore, the pipeline stage numbers are all set to one [1]. (2b) When a physical bank number is two [2], the pipeline stage number is set basically to either one [1] or two [2] according to the two [2] LSBs of a stride value. Here, however, the case of a consecutive operand array (stride value=±1) is treated as an exception, because two [2] sets of thirty-two [32] bit operands enable sixty-four [64] bits to be accessed. More concretely, when the LSB is one [1] or the two [2] LSBs are "double zero [00]", one [1] stage is set, unless the stride value is ±1. Also, when the two [2] LSBs are "one zero [10]", two [2] stages are set, if the stride value is ±1. (2c) When a physical bank number is four [4], the number of pipeline stages is set to "one [1]", "two [2]" or "four [4]" according to the three [3] LSBs of a stride value. Here, however, the case of a consecutive operand array (stride value=±1) is treated as an exception, because two [2] sets of thirty-two [32] bit operands enable sixty-four [64] bits to be accessed. More concretely, when the three [3] LSBs are a "triple zero [000]" or the one [1] LSB is "one [1]", one [1] stage is set, unless the stride value is ±1. Also, when the three [3] LSBs are a "one double zero [100]", two [2] stages are set, unless the stride value is ±1. Finally, when the two [2] LSBs are a "one zero [10]", four [4] stages are set, if the stride value is ±1. Figures 18 through 23 show the models of address pipelines set by the above conditions. Figures 18, 19 and 20 correspond to the case of sixty-four [64] bit operands (refer to Figure 16). Figures 21, 22 and 23 correspond to the case of thirty-two [32] bit operands (refer to Figure 17). In Figures 18 through 23, hatching declining to the left expresses an output address, and hatching declining to the left and right expresses an operand to be accessed. When the physical bank number is one [1] in Figure 18, the set pipeline stage number is fixed at one [1]. When the physical bank number is two [2] in Figure 19, the set pipeline stage number is selected between one [1] and two [2] according to a stride value. When the physical bank number is four [4] in Figure 20, the set pipeline stage number is selected from between one [1], two [2] and four [4] according to a stride value. These are the cases of sixty-four [64] bit operands. When the physical bank number is one [1] in Figure 21, the set pipeline stage number is fixed at one [1], both for a stride value of one [1] and a sixty-four [64] bit access, and for a stride value of two [2] and a thirty-two [32] bit access. When the physical bank number is two [2] in Figure 22, the set pipeline stage numbers are fixed at two [2], both for a stride value being one [1] and a sixty-four [64] bit access, and for a stride value of two [2] and a thirty-two [32] bit access. Also, when the physical bank number is two [2] in Figure 22, the set pipeline stage number is fixed at one [1], for a stride value of three [3] and a thirty-two [32] bit access. When the physical bank number is four [4] in Figure 23, the set pipeline stage numbers are fixed at four [4], both for a stride value of one [1] and a sixty-four [64] bit access, and for a stride value of two [2] and a thirty-two [32] bit access. Also, when the physical bank number is four [4] in Figure 23, for a thirty-two [32] bit access, the set pipeline stage numbers are fixed at one [1] if the stride value is three [3] or at two [2] if the stride value is four [4]. These are the cases of thirty-two [32] bit operands. {2} An address creation system by an indirect address Figures 24 and 25 show the models of address creation according to base address and an indirect value. As is apparent from Figures 24 and 25, this creation system has no regularity in an operand array (op1, op2,...). Thus, it causes the number of prefetched address, i.e., the pipeline stage number, to be fixed at one [1], to enable a bank control circuit to latch an address. To summarize the above, in this embodiment an appropriate address pipeline stage number is flexibly set regardless of a physical bank number. Thus, the pipeline stage numbers are optimized [1] when an address creation is performed by using a stride value or [2] when an address creation is performed by an indirect address. As a result, an advantage is obtained such that a main memory inferior in speed to a cache memory can be used as expeditiously as a cache memory under all circumstances. Depiction of an Actual Embodiment Figures 26 through 32 show an embodiment of a memory access device related to this invention. The configuration is explained first. Figure 26 is a block diagram of an address pipeline determining circuit comprising an address register 10, a comparator 11, a command decoder 12, an external terminal 13, and an address pipeline stage number setter (address pipeline stage number setting means) 14. The address register 10 makes a notification of the n LSBs of a stride value. The comparator 11 judges a match/mismatch between a stride value from the address generating register 10 and a benchmark stride value (±1) representing a consecutive operand array. The command decoder 12 decodes a memory access command, and notifies a distinction between operand lengths (e.g., a distinction between sixty-four [64] bits and thirty-two [32] bits) and a distinction between address creation systems (a distinction between a creation system by a stride value and a creation system by an indirect value). The external terminal 13 notifies the physical bank number (BANK 0 , BANK 1 , ····, BANK m-1 ). The address pipeline stage number setter 14 selectively sets the pipeline stage number from among "one [1]" through "k" based on various pieces of notified information, which are information on the address creation system (D 1 ), information on the operand length (D 2 ), information on whether or not being a consecutive operand array (D 3 ), information on the physical bank number (D 4 ) and information on the n LSBs of a stride value (D 5 ). Figure 27 is a conceptual view of a timing sequencer for use in this embodiment. In Figure 27, three [3] pipelines 21, 22 and 23 correspond respectively to bank numbers one [1], two [2] and four [4]. Each of the pipelines 21, 22 and 23 has an address prefetching part (with hatching declining to the left), an address/data processing part (with cross hatching) and pipeline stage number of data processing parts (with hatching declining to the right). An address prefetching part and data processing part comprise one [1] or more units, corresponding to any of the pipeline stage numbers "one [1]", "two [2]" and "four [4]" set by the address pipeline stage number setter 14. For instance, when the set pipeline stage number is four [4], because four [4] addresses are prefetched, there are four [4] address prefetching parts, one [1] data processing part for processing an address and data after first-outputting the address and before receiving a next memory access request, and four [4] data processing parts for processing four [4] prefetched data after there is no request. Figure 28 is a block diagram of an address creation to which both "an address creation system by a stride value" and "an address creation system by an indirect value" are applied. {1}The case of "an address creation system by a stride value" A selector selects a "stride value". Ordinarily, the value obtained as a product between the stride value and the operand length is the "incremental value" to the base address. The incremental value is constant during an address creation. However, in case of a consecutive operand array, when the operand length is a half of an external data bus, an access in the data bus width is made possible, and the product obtained by multiplying the data bus width becomes the "incremental value" to the base address. Because there are cases in which only one [1] operand can be accessed for a particular starting address of a base address or a particular operand number, the incremental value changes dynamically. Thus, the output address is created by a base address and an incremental value. Since the first output address is nothing but the base address itself, the adder (abbreviated as ADD) does not perform an addition. The second time and thereafter, with the output value from ADD being a base address, the incremental value created by the stride value is added. {2} The case of "an address creation system by an indirect value" A selector selects an "indirect value". The address creation number of indirect values are stored. The product values obtained by multiplying indirect values by an operand length become the "incremental values" to the base addresses. The incremental values constantly change during an address creation. An output address is created by adding to a base address its "incremental value" each time. Here, this system does not feed back an output from ADD as in an address creation system by a stride value. Figure 29 is a conceptual view of an operand updating of an operand number register in an embodiment. Also, as shown in Figure 29, in this embodiment, a register value for setting an operand number is decremented by one [1] each time a memory access is made. Alternatively, the access number in a single memory access is decremented in a batch in a case of a consecutive operand. Figure 30 is a timing chart for the outputting of addresses created by the above described two [2] address creation systems. Generally, a system not prefetching an address defines an address switch timing by a receipt of a data processing consummation notice DC# for the output address. However, in this embodiment, the addresses in the bank number of a main memory for a memory access device are outputted even before an address data processing. This only requires an address to be outputted in advance by giving a pipeline stage number predetermined by the address pipeline stage number setter 14, i.e., a number of prefetched address, of dummy DC#s at an address switch timing. Then, the address needs to be switched in response to an actual DC#. Figure 31 is a conceptual view for generating a dummy DC# for an output switch timing in an embodiment of this invention. More specifically, Figure 31 shows an example in which a dummy DC# needs to be generated for each address prefetching part for a selection timing sequencer. Figure 32 shows an exemplary system configuration with this invention applied. It shows an example of a case in which the bank number is two [2]. In Figure 32, 30 is a microprocessor (memory access device), 31 is an input terminal for notifying the microprocessor 30 of a bank number. Either of the two [2] slave latches 33 and 34 in the bank number receives through a master latch 32 address data A 0 through A 31 from the microprocessor 30. The two [2] slave latches 33 and 34 receive from a latch signal generating circuit 35 a BANK 0 latch signal BL 0 and a BANK 1 latch signal BL 1 , respectively. The latch signal generating circuit 35 comprises composite logical circuits 36 and 37 and flip-flops 38 and 39. Either of the outputs from the composite logical circuits 36 and 37 are of positive logic according to the logic of the fourth LSB (A 28 ) of address data, when both AV# and DC# are of negative logic or when BS# is of negative logic. Flip-flops 38 and 39 synchronize the positive logic output with a clock signal CLK. When the fourth LSB of address data is of negative logic, the output from composite logical circuit 36 on BANK 0 side becomes true. When the fourth LSB is of positive logic, the output from composite logical circuit 37 on BANK 1 side becomes "true". That is, when address data specify BANK 0 , if AV# and DC# are both of negative logic or if BS# is of negative logic, BANK 0 (#0)in the main memory is accessed by having slave latch 33 on BANK 0 side receive the address data. Also, when address data specify BANK 1 , if AV# and DC# are both of negative logic or if BS# is of negative logic, BANK 1 (#1)in the main memory is accessed by having slave latch 34 on BANK 1 side receive address data. Here, 40 is a NOR gate for generating a DC#, 45 is a data master latch, 46 and 47 are data slave latches, and 48 and 49 are data buffers. With this configuration, the address data immediately after initiating a pipeline operation are finalized at a master latch clock timing in an assertive state of BS#, at which time the slave latch on BANK 0 side (#0) or BANK 1 side (#1) sequentially receive them according to the logical level of the fourth LSB of the address. Also, the succeeding address data are finalized at a master latch clock timing in an assertive state of both AV# and DC#, at which time the slave latch on BANK 0 side (#0) or BANK 1 side (#1) sequentially receive them according to the logical level of the fourth LSB of the address. Figure 33 is a functional block diagram of the microprocessor 30 shown in Figure 32. The microprocessor 30 shown in Figure 33 is a vector processor unit (VPU) comprising a vector unit (VU) 61, a command buffer unit (CBU) 62, a control unit (CU) 63, an address unit (AU) 64 and a bus control unit (BU) 65. The vector unit 61 for performing vector operations comprises a vector register (VR) 66 having four [4] banks B0, B1, B2 and B3, a mask register (MR) 67-1 of sixty-four [64] bytes, a scaler register (SR) 67-2, and vector pipelines 68. The vector pipelines 68 perform pipeline processes of an adder (ADD) 72, a multiplier (MUL) 71, a divider (DIV) 73, a graphic processor, a mask processor and a loader/storer 74. The vector unit 61 forms the essential part of the vector processor unit. Operations of the address unit 64 comprising a translation lookahead buffer (TLB) are as shown in Figure 18. Figure 34 is a block diagram of the vector unit 61 shown in Figure 33. The address unit comprises the comparator 11 shwon in Fig. 26, and the bus control unit comprises the address pipeline stage number setter. The SR 67-2 in the vector unit 61 stores an indirect value, a base address, and a stride vlaue. The address unit carries out the process of selector, multiplied by inter times of operand length, add shown in Figure 28. More specifically, Figure 34 shows the parts pertinent to its vector operations. Each of the four [4] banks B0, B1, B2 and B3, in the vector register 66 comprises eight [8] bytes (sixty-four [64] bits) x two hundred fifty-six [256] words. A read bank selector 70 receives the outputs from the four [4] banks B0, B1, B2 and B3. It has ten [10] input terminals each for 64 bits and eight [8] output terminals each for 64 bits. It is a matrix-like circuit allowing data inputted from any input terminal to be freely outputted to any output terminal. The vector pipelines 68 comprise a multiplier 72, an adder 71 and a divider 73, each having two [2] input ports, which receive in 64 bits the input data selected by the read bank selector 70. A write block selector 69 receives from the multiplier 72, the adder 71 and the divider 73 in the vector pipelines 68 respective outputs pipelined in sixty-four [64] bits. It has four [4] input terminals each for sixty-four [64] bits and five [5] output terminals each for sixty-four [64] bits. It is a matrix-like circuit allowing data inputted from any input terminal to be freely outputted to any output terminal. Four [4] of the five [5] output terminals supply their outputs to the vector register 66. The above configuration enables the following operations to be performed. The read bank selector 70 selects the target bank of the vector register 66 from among the four [4] banks B0, B1, B2 and B3. The vector pipelines 68 receive a couple of 64 bits data output from the selected target bank, and performed result obtained by the vector pipelines 68 is selectively input to the target bank of the vector register 66, thereby performing operations between any data of 64 bits. For simultaneous operations, independent data paths and their strict timing management function are required to schedule the data distributions in between the four [4] banks B0, B1, B2 and B3 in the vector register 66 and the multiplexer 71, the adder 72 and the divider 73 in the vector pipelines 68. Corresponding to each port of the four [4] banks B0, B1, B2 and B3 in the vector register 66, the write bank selector 69 and the read bank selector 70 have two [2] read planes and one [1] write plane, working as shuffle circuits. Further, a loader/storer 74 of the vector pipelines 68 is connected to one [1] of the four [4] input terminals of the write bank selector 69 and 64 bits from one [1] of the eight [8] output terminals of the read bank selector 70, and supplies its output, i.e., vector data obtained as the result of operations, are outputted to the bus control unit 65. The operated data, i.e., the input data for operations, are supplied through the selector 69 to the vector register 66. The scaler register 67-2 receives sixty-four [64] bits from one [1] of the five [5] output terminals of the write bank selector 69 and supplies its output to two [2] of the eight [8] output terminals of the read bank selector 70 in 64 bits. One [1] of the five [5] output terminals of the read bank selector 70 outputs 64 bits or another output termainal of the read bank selector 70 outputs 32 bits as an address. The mask register 67-1 is coupled to each of the four [4] banks B0, B1, B2 and B3 in the vector register 66. When operations are performed, the four [4] banks B0, B1, B2 and B3 mask received data according to the contents of the mask register 67-1. Figure 35 is a block diagram of the bus control unit 65 shown in Figure 33. The bus control unit 65 corresponds to the address pipeline stage number setter 14 shown in Figure 16. The inputs and outputs of the vector operations are transmitted through the bus control unit 65, which is a circuit for controlling the interfaces with an external memory device. The address pipeline stage number determiner 81 is a random logic circuit for determining the number of prefetched address from the stride value and the bank number (e.g., "BANK NUMBER=2" shown in Figure 22) of either B0 or B1. It is equivalent to the address pipeline stage number setter 14 shown in Figure 16. It also receives signals representing the least significant bits of the stride values, the designation bit of the successive addresses, the bank number, the designation of sixty-four [64] bits or thirty-two [32] bits, and the choice of indirect values. It supplies a pipeline decode value to a timing sequencer 82. Although this embodiment assumes that the number of banks is two [2], if the number of banks is four [4], the pipeline stage number combination is as shown in Figures 16 and 17. The timing sequencer 82 controls the bus state. The pipeline stage number outputted from the address pipeline stage number determiner 81 determines the bus state number. An external input signal supplied through the external terminal control circuit 84 and a timing signal cause a sequential change in the bus state signals, e.g., AV#, BS#, DS# and R/W#. The bus mode controller 83 shown in Figure 33 receives a decoded output from a decode unit 86 in the control unit 63. It is a circuit for determining a bus cycle mode, such as "load" and "store", from a command and an operating logic of an external terminal. An external terminal controller 84 is a circuit for controlling the directions of external input, output and input/output terminals. It also controls the output timing of an external input signal and a bus state signal. A bus right controller 85 controls the acquisition of an external bus right. When it acquires an external bus right, the external terminal controller 84 controls an external circuit, e.g., a memory, by using the acquired external bus. The external terminal controller 84 of the bus control unit 65 allows vector data to be exchanged between the vector pipelines 68 and the memory. Figure 36 is a block diagram of a scoreboard 87 in the control unit 63 shown in Figure 33. The scoreboard 87 comprises a group of decoder registers 91, a group of scoreboard registers 92, and a selector 93. Each register in the group of decoder registers 91 generates a set signal for setting a to-be-used register number and reset signal for resetting the register number after used. The group of scoreboard registers 92 comprise a plurality of SR-FFs (set/reset flip-flops). The selector 93 outputs a memory state of one of the group of scoreboard registers 92 corresponding to the register number supplied as a read register number. The group of scoreboard registers 92 check the inter-command conflicts among its registers when the parallel pipelines are executed. Before a command execution, the designation of the register used by the command (i.e., the set signal for the register designated by a register number) is supplied. Each register in the group of decoder registers 91 decodes whether or not the set signal is for itself. Each register in the group of decoder registers 91 decodes a register number, a set signal and a clear signal. On receiving the set signal for itself, a register in the group of decoder registers 91 outputs the set signal for the corresponding register in the group of scoreboard registers 92. On receiving the clear number for itself, a register in the group of decoder registers 91 outputs the reset signal for the corresponding register in the group of scoreboard registers 92. Thus, the set signal and the reset signal from a register of the group of decoder registers 91 cause a change in the state of the corresponding register in the group of scoreboard registers 92 (i.e., the corresponding one of the SR/FFs), thereby allowing the register state to be stored. That is, a receipt of a set signal by a register in the group of decoder registers 91 enables the corresponding register (i.e., the corresponding one of the SR-FFs) in the group of scoreboard registers 92 to be set for its use. This means that the currently executed command uses the set register. On completing the command execution, the register in the group of decoder registers 91 decodes an inputted clear signal and outputs a reset signal, which resets the corresponding register (i.e., the corresponding one of the SR-FFs) in the group of scoreboard registers 92. On receiving a reset signal, the corresponding register (i.e., the corresponding one of the SR-FFs) in the group of scoreboard registers 92 is reset and no longer used. Figure 37 is a block diagram of the pipeline control unit 88 shown in Figure 33. The pipeline control unit 88 receives a start signal for invoking pipelines, e.g., multiplexer pipelines, adder pipelines and divider pipelines, and a vector length (number "i" of the vector length) to be processed. The pipeline control unit 88 then generates an END signal for terminating respective pipelines and, in case of a register conflict, a scoreboard clear signal. Vector conversion circuits 95-1 and 95-2 are random logic circuits for converting the signal representing the inputted vector length to a form matching the internal control timing. Comparators 96-1 and 96-2 receive the outputs from the vector conversion circuits 95-1 and 95-2, respectively. Meanwhile, the counter 97 generates from a vector length and a value of the counter 97 a terminating timing (an END signal) for each pipeline and a scoreboard clear signal. A counter 97 starts counting clocks after receiving a start signal. The comparators 96-1 and 96-2 receive at their other input terminals the values of the counter 97. On detecting a match of the vector length conversion value converted by vector conversion circuit 95-2, comparator 96-2 outputs a scoreboard clear signal and continues the counting operation. On detecting a match of the vector length conversion value from vector conversion circuit 95-1, comparator 96-1 outputs an END signal. On receiving at its stop input terminal the END signal, the counter 97 stops its counting operation. The pipeline is operated when the pipeline operation instruction P# indicates "0", and the number of stages of the pipeline is detected internally by the VPU during the operation in the basic cycle to set the system ready to switch the pipeline mode to 1, 2, or 4 (the number of pipelines) immediately after a pipeline enable signal PEN# is asserted. Figures 38, 39, 40, and 41 show the timing when "pipeline=1". Figure 38 shows the timing with no wait; Figure 39 shows the timing with wait 1; Figure 40 shows the timing with wait 2; and Figure 41 shows the timing with wait 3. BCO through 7# are byte control signals and indicate the number of significant bytes from the currently outputted address. In the embodiment in Figure 37, the signal not shown indicates the number of significant bytes from the position pointed by the address. The cycle T2 is defined as the cycle T2P1 when "pipeline=1". When a PEN# is detected as asserted at the rising edge of a clock at the end of the cycle T2P1 during the operation in the basic cycle, the mode is changed to "pipeline=1". In this case, control is transferred to the following pipeline modes when a PEN# is asserted at the cycle T2P1. 1. pipeline mode with no wait if a DC# is asserted (Figure 38) 2. pipeline mode with wait if a DC# is negated (Figures 39, 40, and 41) A pipeline mode with no wait is operated in a P1B, P1, or P1E cycle, while a pipeline mode with wait is operated in a cycle P1S, P1, or P1E. Each cycle is described below in detail. [Cycle P1B] When a DC# as well as a PEN# is detected as asserted at a cycle T2P1, the cycle T2P1 is switched to a cycle P1B indicating the beginning of a cycle with no wait. In the cycle P1B, an AV# indicating a switch to the pipeline mode is asserted and a prefetched address is outputted. In the write cycle, write data are updated and a BS# is asserted. A BS# is asserted because, in the pipeline mode, a DC# corresponding to the prefetched address outputted in the cycle P1B cannot be asserted in that cycle even though the cycle is operated without wait, thereby having no signals to latch an output address. Accordingly, a BS# is asserted so that the prefetched address can be recognized by an external circuit. At the end of the cycle, a DC# is not detected for the above described reason and control is transferred to a cycle P1 unless a pipeline termination condition has occurred. The cycle P1B is not operated with wait. [Cycle P1S] When a PEN# is asserted and a DC# is negated in the cycle T2P1, the cycle T2P1 is switched to a cycle P1S indicating the beginning of a cycle with wait. In the cycle P1S, an AV# indicating a change to the pipeline mode is asserted and a prefetched address is outputted. Since a DC# is negated at the end of the cycle T2P1, write data are not updated in the write cycle. However, in the read cycle, a DC# is asserted and read data are imported. In this cycle, a BS# is not asserted because a prefetched address can be recognized as long as a DC# is asserted. If a DC# is detected and asserted at the rising edge of a clock at the end of this cycle and unless a pipeline termination condition has occurred, control is transferred to the cycle P1. If a DC# is negated, control is transferred to the cycle P1SW for retaining the state of the cycle P1S, and the wait cycle is repeated until a DC# is asserted. [Cycle P1] In the cycle P1, a prefetched address is updated, write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to the next cycle P1. Control is transferred to a cycle P1E if a DC# is asserted and a pipeline termination condition has occurred. Control is transferred to a cycle P1W for retaining the state of the cycle P1 if a DC# is negated in this cycle, and the wait cycle is repeated until a DC# is asserted. An AV# is retained as asserted in this cycle. [Cycle P1E] Transfer to the cycle P1E indicates that a pipeline termination condition has occurred. Therefore, addresses are outputted no more in this cycle, and an AV# indicating a signal for asserting an address output in a pipeline is negated. The only process in this cycle is performed on data associated with prefetched addresses. Write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, the pipeline cycle is terminated and all the output signals involved are negated. If A DC# is negated, control is transferred to a cycle P1EW for retaining the state of the cycle P1E, and the wait cycle is repeated until a DC# is asserted. Figures 42, 43, 44, and 45 show the timing when "pipeline=2". Figure 42 shows the timing with no wait; Figure 43 shows the timing with wait 1; Figure 44 shows the timing with wait 2; and Figure 45 shows the timing with wait 3. The cycle T2 is defined as a cycle T2P2 when "pipeline=2". When a PEN# is detected as asserted and a DC# is negated at the rising edge of a clock at the end of the cycle T2P2 during the operation in the basic cycle, the mode is switched to "pipeline=2". The VPU ignores the assertion input of a PEN# if, in the cycle T2P2, a DC# is asserted although a PEN# is asserted, and the mode is not switched to "pipeline=2" but to the basic mode. When the mode is switched to "pipeline=2", a DC# is detected for the first time at the rising edge of a clock at the end of the cycle at one clock after the cycle T2P2. In this cycle, control is transferred to the following pipeline modes. 1. pipeline mode with no wait if a DC# is asserted (Figure 42) 2. pipeline mode with wait if a DC# is negated (Figures 43, 44, and 45). A pipeline mode with no wait is operated in a cycle P2B1, P2B2, P2, P2E2, or P2E1, while a pipeline mode with wait is operated in the cycle P2B1, P2S2, P2, P2E2, or P2E1. Each cycle is described below in detail. [Cycle P2B1] When "PEN#" is detected as asserted and "DC#" is detected as negated in the cycle T2P2, the cycle T2P2 is changed to the cycle P2B1. In the cycle P2B1, an AV# indicating that control is transferred to the pipeline mode is asserted and a prefetched address is outputted. Then, a BS# is asserted to recognize a prefetched address. Also in this cycle, write data are not updated in the write cycle, while read data are imported in the read cycle when a DC# is asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to a cycle P2B2. If a DC# is negated and a pipeline termination condition has not occurred, control is transferred to a cycle P2S2. The cycle P2B1 is not operated with wait. [Cycle P2B2] In the cycle P2B2, prefetched addresses are outputted, write data are updated in the write cycle, but read data are not imported in the read cycle. Since a DC# is not detected in this cycle, a BS# is continuously searched for assertion to recognize a prefetched address. The cycle P2B2 is switched to a cycle P2 unless a pipeline termination condition has occurred. The cycle P2B2 is not operated with wait. [Cycle P2S2] Prefetched addresses are outputted in the P2S2. However, since a DC# is negated in the previous cycle P2B1, write data are not updated in the write cycle and data are imported in the read cycle when a DC# is asserted. In this cycle, a BS# is not asserted because a DC# is detected as asserted and a prefetched address is recognized. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to the cycle P2. If a DC# is negated, control is transferred to the cycle P2S2W for retaining the state of the cycle P2S2 and the wait cycle is repeated until a DC# is asserted. [Cycle P2] In the cycle P2, a prefetched address is updated, write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to the next cycle P2. If a DC# is asserted and a pipeline termination condition has occurred, control is transferred to a cycle P2E2. If a DC# is negated in this cycle, control is transferred to a cycle P2W for retaining the state of the cycle P2, and the wait cycle is repeated until a DC# is asserted. An AV# is retained as asserted in this cycle. [Cycle P2E2] Transfer to the cycle P2E2 indicates that a pipeline termination condition has occurred. Therefore, addresses are outputted no more in this cycle, and an AV# indicating a signal for asserting an address output in a pipeline is negated. The only process in this cycle is performed on data associated with prefetched addresses. Write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, control is transferred to a cycle P2E1. If a DC# is negated, control is transferred to a cycle P2E2W for retaining the state of the cycle P2E2, and the wait cycle is repeated until a DC# is asserted. [Cycle P2E1] In the cycle P2E1, write data are updated in the write cycle and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, the bus cycle is terminated and all the output signals involved are negated. If a DC# is negated, control is transferred to a cycle P2E1W for retaining the state of the cycle P2E1, and the wait cycle is repeated until a DC# is asserted. Figures 46, 47, 48, and 49 show the timing when "pipeline=4". Figure 46 shows the timing with no wait; Figure 47 shows the timing with wait 1; Figure 48 shows the timing with wait 2; and Figure 49 shows the timing with wait 3. A cycle T2 is defined as a cycle T2P4 when "pipeline=4". When a PEN# is detected as asserted and a DC# is negated at the rising edge of a clock at the end of the cycle T2P4 during the operation in the basic cycle, the mode is switched to "pipeline=4". The VPU ignores the assertion input of a PEN# if, in the cycle T2P4, a DC# is asserted although a PEN# is asserted, and the mode is not switched to "pipeline=4" but to the basic mode. When the mode is switched to "pipeline=4", a DC# is detected for the first time at the rising edge of a clock at the end of the cycle at three clock after the cycle T2P4. In this cycle, control is transferred to the following pipeline modes. 1. pipeline mode with no wait if a DC# is asserted (Figure 46) 2. pipeline mode with wait if a DC# is negated (Figures 47, 48, and 49). A pipeline mode with no wait is operated in a cycle P4B1, P4B2, P4B3, P4B4, P4, P4E4, P4E3, P4E2, and P4E1 while a pipeline mode with wait is operated in a cycle P4B1, P4B2, P4B3, P4S4, P4, P4E4, P4E3, P4E2, and P4E1. Each cycle is described below in detail. [Cycle P4B1] When a PEN# is detected as asserted and a DC# is detected as negated in the cycle T2P4, the cycle T2P4 is switched to a cycle P4B1. In the cycle P4B1, an AV# indicating that control is transferred to the pipeline mode is asserted and a prefetched address is outputted. Then, a BS# is asserted to recognize a prefetched address. Also in this cycle, write data are not updated in the write cycle, while read data are not imported in the read cycle. A DC# is not detected at the end of this cycle, and control is transferred to a cycle P4B2 unless a pipeline termination control has occurred. The cycle P4B1 is not operated with wait. [Cycle P4B2] Prefetched addresses are outputted first in the cycle P4B2, and a BS# is asserted to recognize prefetched addresses. Write data are not updated in the write cycle, or read data are not imported in the read cycle. A DC# is not detected at the end of this cycle, and control is transferred to a cycle P4B3 unless a pipeline termination condition has occurred. The cycle P4B2 is not operated with wait. [Cycle P4B3] Prefetched addresses are outputted in the cycle P4B3, and a BS# is asserted to recognize prefetched addresses. Write data are not updated in the write cycle, but read data are imported in the read cycle when a DC# is asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to a cycle P4B4. If a DC# is negated and a pipeline termination condition has not occurred, control is transferred to a cycle P4S4. The cycle P4B3 is not operated with wait. [Cycle P4B4] In the cycle P4B4, prefetched addresses are outputted, and a BS# is asserted to recognize prefetched addresses. Since a DC# is asserted in the cycle P4B3, write data are updated in the write cycle, but read data are not imported in the read cycle. A DC# is not detected at the rising edge of a clock at the end of this cycle, and control is transferred to a cycle P4 unless a pipeline termination condition has occurred. The cycle P4B4 is not operated with wait. [Cycle P4S4] In the cycle P4S4, prefetched addresses are outputted. However, since a DC# is negated in the previous cycle P4B3, write data are not updated in the write cycle, but read data are imported in the read cycle when a DC# is detected as asserted. In this cycle, a BS# is not asserted since prefetched addresses can be recognized if a DC# is detected as asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to the cycle P4. If a DC# is negated, control is transferred to a cycle P4S4W for retaining the state of the cycle P4S4 and the wait cycle is repeated until a DC# is asserted. [Cycle P4] In the cycle P4, prefetched addresses are updated, write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, and unless a pipeline termination condition has occurred, control is transferred to the next cycle P4. If a DC# is asserted and a pipeline termination condition has occurred, control is transferred to a cycle P4E4. If "DC#" is negated in this cycle, control is transferred to the cycle P4W for retaining the state of the cycle P4, and the wait cycle is repeated until a DC# is asserted. [Cycle P4E4] Transfer to the cycle P4E4 indicates that a pipeline termination condition has occurred. Therefore, addresses are outputted no more in this cycle, and an AV# indicating a signal for asserting an address output in a pipeline is negated. The only process in this cycle is performed on data associated with prefetched addresses. Write data are updated in the write cycle, and read data are imported in the read cycle. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, control is transferred to a cycle P4E3. If a DC# is negated, control is transferred to a cycle P4E4W for retaining the state of the cycle P4E4, and the wait cycle is repeated until a DC# is asserted. [Cycle P4E3] In the cycle P4E3, write data are updated in the write cycle and read data are imported in the read cycle when a DC# is asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, control is transferred to a cycle P4E2. If a DC# is negated, control is transferred to a cycle P4E3W for retaining the state of the cycle P4E3, and the wait cycle is repeated until a DC# is asserted. [Cycle P4E2] In the cycle P4E2, write data are updated in the write cycle and read data are imported in the read cycle when DC# is asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, control is transferred to a cycle P4E1. If a DC# is negated, control is transferred to a cycle P4E2W for retaining the state of the cycle P4E2 and the wait cycle is repeated until a DC# is asserted. [Cycle P4E1] In the cycle P4E1, write data are updated in the write cycle and read data are imported in the read cycle when a DC# is asserted. If a DC# is detected as asserted at the rising edge of a clock at the end of this cycle, the bus cycle is terminated and all the output signals involved are negated. If a DC# is negated, control is transferred to a cycle P4E1W for retaining the state of the cycle P4E1, and the wait cycle is repeated until a DC# is asserted. Each of the above described cycles, that is, each state, is determined by a timing sequencer 82 and outputted as a bus state signal to an external terminal controller 84. Figure 50 shows the configuration of the external terminal controller 84. The bus state signal outputted by the timing sequencer 82 is a signal corresponding to each of the above described cycles and applied to a BS# terminal unit 101, a DS# terminal unit 102, and an AV# terminal unit 103. A bus right controller 100 outputs a request signal HREQ# when a bus use right request is issued. When an acknowledge signal HACK# is inputted in response to the request signal, a bus right acquisition signal is outputted as an acknowledgement of a bus right to the BS# terminal unit 101, the DS# terminal unit 102, and the AV# terminal unit 103. Likewise, a 3-state control signal indicating the state of an output terminal when a bus is going to be used is outputted to the BS# terminal unit 101, the DS# terminal unit 102, and the AV# terminal unit 103. In addition to the above described signals, a DC# and a PEN# are applied as a DCX and a PENX respectively to the BS# terminal unit 101, the DS# terminal unit 102, and the AV# terminal unit 103 through two steps of inverters I 1 and I 2 , that is, buffers. According to these signals, the BS# terminal unit 101 outputs a BS#, the DS# terminal unit 102 outputs a DS#, and the AV# terminal unit 103 outputs an AV#. Figure 51 shows the detailed configuration of the BS# terminal unit 101. When a bus right acquisition signal, a start signal, and a signal Ti from the timing sequencer indicate "1" level, an AND gate 111 outputs "1" level and sets a set/reset flip-flop 113 in synchronous with a clock CLK through an OR gate 112. Additionally, an AND gates 114 or 115 output "1" level and set the set/reset flip-flop 113 in synchronous with the clock CLK through OR gates 112 and 116 when both an internal bus access request signal IBRX and a PENX indicate "0" level and DCX in the T2P1 cycle, or when both an IBRX and a PENX indicate "0" level and DCX indicates "1" level in the T2P2 cycle. The output of the set/reset flip-flop 113 is applied to a 3-state buffer 117. According to the 3-state control signal, the 3-state buffer 117 outputs as a BS# a set state of the set/reset flip-flop 113. The set state is indicated by "0" level of BS#. In the cycle T1, P1B, P2B2, or P4B4, the set/reset flip-flop 113 is reset through an OR gate 118. The set/reset flip-flop 113 is reset through the OR gate 118 by the outputs of AND gates 119, 120, and 121 when at least either of an IBRX and a DCX indicates "1" level in the cycle P2B1 or P4B3, or when an IBRX indicates "1" level in the cycle P4B1 or P4B2. On such reset conditions, the BS# indicates "1" level through the 3-state buffer 117. Summing up the operation shown in Figure 51, a signal from the timing sequencer is decoded by the decoding circuit comprising the AND gates 111, 114, 115, 119, 120, and 121, and the OR gates 112, 116, and 118 to set or reset the set/reset flip-flop 113. The result is outputted through the 3-state buffer 117. The above described operation is performed similarly for a DS# or an AV#. Figure 52 shows the detailed configuration of the DS# terminal unit 102; and Figure 53 shows the detailed configuration of the AV# terminal unit 103. In Figure 52, a set/reset flip-flop 130 is set in the cycle T1, and reset by decoding a DCX, a PENX, and signals which indicate being in the cycle T2P1, T2P1W, T2P2, T2P2W, T2P4, T2P4W, P1E, P1EW, P2E1, P2E1W, P4E1, and P4EW. using the decoding circuit comprising AND gates 131 and 132 and OR gates 133 and 134. The result is outputted through a 3-state buffer 135. Likewise, as shown in Figure 53, a set/reset flip-flop 140 is set by decoding an IBRX, a DCX, a PENX, and signals which indicate being in the cycle T2P1, T2P2 or T2P4 using the decoding circuit comprising AND gates 141 and 142 and an OR gate 143. It is reset by decoding a DCX IBRX, and signals which indicate being in the cycle P1B, P2B2, P4B1, P4B2, P4B4, P1S, P1SW, ... (shown on the left side in Figure 53) using the decoding circuit comprising AND gates 144, 145, 146, and 147 and an OR gate 148. The output of the set/reset flip-flop 140 is outputted, similarly as described above, through a 3-state buffer 149. A BS#, a DS#, and an AV# are outputted through the above listed circuit. Each of the above listed cycles is outputted by the timing sequencer. Figure 54 shows the configuration of the timing sequencer. Each of the cycles and circuits for generating a BS#, DS#, and AV# are described in the explanation above. These circuits are shown in Figures 51, 52, and 53, and determine the timing of outputting signals according to bus state signals outputted by the timing sequencer 82. Figure 54 shows the detailed configuration of the timing sequencer 82 when "pipeline=1". It is configured similarly when "pipeline=2" or "pipeline=4", and the respective explanation is skipped here. The timing sequencer 82 comprises 11 latches, 9 OR gates, and several AND gates shown in Figure 54. These AND gates are not shown by usual gate marks, but the logic is indicated by a mark ("assertion" by a white circle and "negation" by a black circle added near the corresponding line) for representing the state of an output of each latch. For example, the output of a latch P1EW is re-entered through an OR gate if a DC# is negated, and is applied to an OR gate if a DC# is asserted. The portions enclosed by dotted lines shown in Figure 54 are shown as the circuit enclosed by an alternate long and short dash line. Since the above described eleven latches are provided corresponding to each of the cycles shown in Figures 38, 39, 40, and 41, each latch is assigned the same symbol as the corresponding cycle. They are in the idle state when the processor is in the wait state, while a latch Ti is set for operation. If, on this condition, the system is started and a bus acquisition is asserted, a latch T1 is set through an OR gate. In the cycle T1, a latch to be set in the next stage is determined according to the pipeline stage number outputted by the address pipeline stage number setter 14 shown in Figure 26. That is, an AND logic is obtained between the latch T1 and the output 1 - K obtained by decoding the pipeline stage number outputted by the address pipeline stage number setter 14, thereby setting the latch in the next stage. In Figure 54, a circuit having the pipeline stage number "1" is referred to. If the number other than "1" is referred to, latches not shown in the figure is set. If the pipeline stage number is "1", a latch T2P1 is set. Thereafter, if a DC# and an IBR# are asserted but a PEN# is negated, a bus is not accessed and the latch T1 is set again. The IBR# is an internal bus request outputted by an address unit 64 shown in Figure 33. A latch P1B is set when a DC#, PEN#, and IBR# are asserted after the latch T2P1 is set. A latch PIS is set when a DC# is negated and PEN# and IBR# are asserted. Being negated a DC#, that is, a DC# is not returned, indicates it cannot be accessed within the clock. If a DC# is negated with the latch P1S set, a latch P1SW is set and the P1SW retains set until the DC# is asserted. The state P1B is different from the state P1S in that a DC# is asserted in the state T2P1. In the state P1B, the BS# is outputted again. A latch P1 is set when an IBR# is asserted in the state P1B, a DC# and an IBR# are asserted in the state P1S, and a DC# and an IBR# are asserted in the state P1SW. In the cycles P1B and P1S, one address is outputted first. In the cycle P1, an address and data are processed. The latch P1 is set again when a DC# and an IBR# are asserted, that is, a DC# is returned and an internal bus request IBR# is issued after the latch P1 is set. A latch P1W is set when a DC# is negated, that is, a DC# is not returned, for example, when the memory works slowly or a DRAM is refreshed. The latch P1W retains set until the DC# is asserted. A latch P1E is set if there are no more internal requests in the states P1 and P1W, that is, an IBR# is negated. In these states, an address need not be outputted, but data are processed. If a DC# is returned in the state P1E, the system enters an idle state. If a DC# is not returned, the state P1EW is set and repeated until a DC# is provided. According to the operation above, the state is sequentially changed and a latch is set depending on each state. That is, the state varies correspondingly. The present invention is configured such that the above described BS#, DS#, and AV# are controlled according to the state indicated by each latch in order to effectuate the process speed of an external memory. As we have reviewed its configurations and operations, this invention enables pipeline stage numbers to be set flexibly regardless of a physical bank number, thereby avoiding a pipeline operational inconvenience by preventing an address interference.

Claims: A memory access device for accessing a memory means having a plurality n of independently accessible banks (BANKO, BANK1,...), the device comprising: a pipeline stage number setting means (14,21,22,23) arranged to set the number of pipeline stages in a pipeline operation for accessing a next-to-be-used one of said banks, before completing an access to a currently-used one of said banks, so that not more than n banks are accessed; and a means (30) for generating an address of said next-to-be-used bank and means for switching a bank from said currently-used bank to said next-to-be-used bank in accordance with said number of pipeline stages set by said pipeline stage number setting means; wherein: said pipeline stage number setting means (14,21, 22,23) is arranged to set said number of stages related to a command execution based on a stride value and said number n of banks in said memory means; and said address generating means (30) is arranged to generate an operand address pertinent to said command execution in said number of pipeline stages set by said pipeline stage number setting means. The memory access device according to claim 1, wherein: said pipeline stage number setting means (14,21, 22,23) is arranged to set said number of pipeline stages based on at least one of a piece of information indicating whether operands are successive and a piece of information indicating an address generation mode. The memory access device according to claim 1, wherein: said address generating means (30) is arranged to increment the operand address related to said pipeline operation by the product obtained through multiplying a stride value by an integer value times an operand length. The memory access device according to claim 1, wherein: said memory means is arranged to sequentially switch designated banks when addresses in a bus width change sequentially. The memory access device according to claim 4, wherein: said memory means provides an address latch circuit (33,34) at an address input terminal for each of said n banks for accessing an address of said memory means, and a bi-directional buffer (46,48,47,49) having a latch (45) in the write direction at a data terminal, and is operable to: supply write data to said bi-directional buffer by temporarily storing said write data in said latch in said bi-directional buffer during a write operation; and output data directly from said bi-directional buffer during a read operation. The memory access device according to claim 3, wherein: said n banks are configured with addresses for sequencing blocks of address spaces partitioned into predetermined data widths and said memory means is arranged to store in one of said banks an operand having a length of a whole or half of said predetermined data width; said pipeline stage number setting means is arranged to set said pipeline stage number based on said length of said operand, said predetermined data width, said integer value and the number n of said banks; and said address generating means is arranged to execute data accesses in pipelines in a distance corresponding to said integer value times the length of said operand. The memory access device according to claim 1, wherein said bank switching means provides, for each of said n banks respectively: a first latch (38,39) arranged to receive and store a control signal designating the respective bank, derived from the LSB side of an address issued by a processor (30); a second latch (33,34) arranged to receive and store said address from the processor (30) and arranged to transmit the address to the respective bank in response to said control signal; and a buffer (48,49) and a data latch (46,47) both connected to a data terminal of the respective bank for exchange of data with the bank.

Inventors: IINO HIDEYUKI, TAKAHASHI HIROMASA, IINO, HIDEYUKI, TAKAHASHI, HIROMASA, IINO, Hideyuki, c/o Fujitsu Limited, TAKAHASHI, HIROMASA, C/O FUJITSU LIMITED
Applicants: FUJITSU LTD, FUJITSU LIMITED
Application year: 1992
Main classification: G06F12
IPC codes: G06F13, G06F12