Multiprocessor system having distributed shared resources and dynamic and selective global data replication and method therefor

Abstract: Multiprocessor system having distributed shared resources and dynamical and selective global data replication in which a plurality of processors (CPU0,1,2,3) communicate each with the other through a system bus (5), each CPU (CPU0,1,2,3) is provided with a local memory 8 storing data used locally and global data shareable by a plurality of processes operative in differing CPUs and therefore replicated in the local memory of each CPU, and in which global data replication is performed, at page level only when a global data page is effectively needed by a plurality of processes operative in differing CPUs and in those CPUs where the page is needed, the replication in the other CPUs being performed in a predetermined trash page 8C of the local memory so that memory space required for replication is minimized as well as traffic on the system bus for global data replication and global data writes required for assuring global data consistency.

Description: The present invention relates to a multiprocessor system having distributed shared resources and dynamic and selective global data replication. It also refers to the related method for dynamic and selective allocation of global data. The modern data processing systems may perform several processes at the same time and are defined multiprocessing systems. Whilst a program may be defined as a sequence of ordered instructions which perform on a set of data, a process is shortly defined as "an address space, a thread of control which operates within that address space and the set of required system resources". The execution of a program requires the creation of one or more processes, that is the set up, in terms of addressable space, and the organization of the required resources and their operation. The data needed for program execution and on which the program operates must be loaded in the process space. A physical working memory space must necessarily correspond to the process space as a material support for the data. In a multiprogramming system (or even simply in a multiprocessing system) the joint generation of a plurality of processes is implied. Then it may happen that some of the data used in differing processes, in case at subsequent times, are the same for more processes. These data are defined as "shared data". The problem has therefore arised to avoid the loading of the same data, used in more processes, simultaneously or subsequently actives, in an address space, hence in a physical memory space, differing for each process, with the need to replicate the same information for each process or to move it from one space to another, depending on the process. Therefore the concept of shared memory, typical of the UNIX (Registered Trademark) operating system, has arised, as memory space intended for storing shared data. The several processes which must operate on shared data, get the shared data from this shared memory. In the modern data processing systems and in order to obtain higher performances, a plurality of processors are jointly used, which processors may jointly and simultaneously execute a plurality of processes. The processors are interconnected by a system bus, through which they communicate among them and with common shared resources, such as input/output units and working memories. To overcome the performance limitations imposed by the system bus and to reduce the competition in the access to the system bus, local memories are used too. A local memory is related to a processor and may be accessed by the related processor without need to obtain access to the system bus. Local memories are preferably used to store "local data" only used by the related processor in the processes executed by the related processor. As far as "shared data" are concerned, the multiprocessor architecture poses some problem. It is clear that several processors may operate with a plurality of processes on the same shared data. Therefore, in a multi processor system the concept may be introduced of local data, shared or unshared, as data used in the processes performed in a single processor, and global data, that is shared data which are used by more processes executed in differing processors. The global data may be stored in a single shared memory, which may be accessed through the system bus, or in one or more local memories to which the unrelated processors may have access through the system bus, with the already indicated drawbacks. To overcome, at least in part, this drawback, it has been recently proposed and described in the EP-A-0320607, published 21/06/1989, the concept of replicated global data. According to this concept, the global data are stored and replicated in each of the local memories of a multi processor system. In this way, each system processor may read the global data in its related local memory without having access to the system bus. In case a write operation is performed on global data, access to the system bus is required to write the data in all local memories, thus assuring its consistency everywhere. This drawback is largely balanced by the resulting advantages. A second drawback is that the local memories must be sized to store the global data. Each of them must therefore have a large capacity, adequate for storing all the global data which may be required for paallel execution of several processes. To contain in economically acceptable limits the capacity of the local memories it is therefore required to keep the global data and related replication at a minimum. With this aim, the italian patent application N. 22593A/89 filed on Dec.4 1989 discloses the concept of dynamic managing of global data. Several global data, particularly those required in user processes (as opposed to global data used by the supervisor operating system) may be effectively used by more processors only in particular circumstances and temporarily. For most of the time, even if potentially shareable by more processes in a plurality of processors they are used in one processor only. Therefore these data are treated as local data and are replicated and treated as global data only when more processors use them. The conversion from local data to global data, and vice versa, is performed dynamically at run time. In this way, as long as these data are qualified as local, no memory space is required in each and all the local memories for their allocation, nor replication operations, hence system bus access operations are required to provide consistency of the several copies. It is desirable, with the aim to a more efficient use of the local memories, to further limit the replication of global data, performing it with selective criteria, in the local memories only, where it is needed and not in the others. This approach would require the development of complex and sophisticated replication mechanisms, which should permit to control write operations in selected local memories and to verify that such operations have been performed. It would be required to develop interprocessor communication systems and procedures allowing each processor to know if certain data are used by other processors, and by which of them, with so heavy drawbacks, that the practical embodiment would offer no advantage. By reverse, this objective is achieved in the multiprocessor system with dynamic and selective global data replication of the present invention, in a very simple way which, rather than introducing complications in the interprocessor communication mechanisms, makes them simpler. The invention is defined in claims 1 and 3. According to the invention the global data, as long as used by one processor only, are stored only in the local memory related to the one processor and qualified as local data. They are qualified as global data only when a second processor at least requires their use. On this occurrence a command is issued for their replication in all local memories. In the processors which actually do not need to use these data, the replication is performed in a predetermined and limited physical memory space, defined as "trash page" so that no memory space is used for these data, except the one of the trash page. In this way, even if the replication operation is indifferentiated, affects all processors and can be controlled in a simple and feasible way, the allocation of the global data is performed in selective way and is controlled not by the processor which requests the replication, but by the processors which must execute it and which decide, in autonomous way, where to perform it. If a processor needs global data which have been previously discarded, a further replication is requested, this time being performed in a useful space of the local memory. Likewise, if a processor does not need any more some global data, they can be conceptually moved in the trash page, making a corresponding memory space available for other use. The global data take again the qualification of local data when their use is required by one processor only, not by the others. Thereafter the possible modification operations involving them, are performed locally only. These advantages are achieved, in a substantially conventional system architecture, with the use of two distinct, address translation units in each of the system processors, of a local memory in each of the processors, the local memory having a storage area characterized as trash page, which may be real or fictitions, and is specifically devoted to store discarded information, of predetermined tables which describe the status of the memory pages, in each of the local memories and by means of particular changes to the hardware/software page fault mechanism (that is of the procedures which manage a page fault signal) and disconnect procedures which provide exit from a system process. The dynamic and selective global data replication in local memories of the system requires that the same global datum has to be unequivocally referenced at system level and that its physical allocation has to be managed in independent way in each of the processors. To this purpose a global datum is referenced at system level, by a single address, conventionally defined as "real" to distinguish it from the physical address. The real address is converted in a physical address, locally and autonomously in each processor, by an address translation unit coupled to each local memory. Given that the multiprocessor system of the present invention, as well as those described in the cited patent applications, make use of the virtual memory concept, it results that each system processor is provided with a first memory management unit or MMU which converts logical or virtual addresses, used at SW level, directly in physical addresses in case of local data, and in real addresses, in case of global data. The real addresses are then locally converted in physical addresses by a second translation unit. With this approach, in case of replication of the same global datum, this one may be locally stored at different physical spaces and selectively in the trash page. After these introductory considerations, the features and the advantages of the invention will result more clearly from the following description of a preferred form of embodiment and from the enclosed drawings where: Figure 1 is a block diagram of a multiprocessor system having shared resources and providing a dynamic and selective replication and management of global data, in accordance with the present invention. Figure 2 shows the format of the addresses generated by the memory management units (MMU) in the system of Fig. 1. Figure 3 shows the memory tables which are used by a memory management system of conventional kind in the system of Fig. 1. Figure 4 shows the memory tables, which are used according to the present invention for the dynamic and selective replication and management of global data and the data segments to which they pertain. Figure 5 shows the structure of one of the tables of Fig. 4 which describes the features of a global data segment. Figure 6,7,8,9 shows by way of example, the contents of the table of Fig. 5 at subsequent times. Figure 10 shows in flow diagram the operations performed by a system primitive (shm-get) for the creation of a shared memory segment. Figure 11 shows in flow diagram the operations performed by a system primitive (shm-at) for the connection of a shared segment to a process. Figures 12 and 13 shows in flow diagram the operation of a memory management system for the handling of page faults caused by access to shareable data. Figure 1 shows, in block diagram, a multiprocessor system capable of global data replication and dynamic and selective management in accordance with the present invention. A multiprocessor system similar to the one shown in Fig.1 is described in detail in the EP-A-320607 as well as in the European patent applications N. 89120432.3 filed Nov. 4 1989, N. 89120433.1 filed Nov. 4 1989 and in the Italian Patent Application N. 19787 A/89 filed March 15 1989, to which reference is made for all information not provided herein. The system of Fig. 1 comprises four central processing units CPU0,CPU1,CPU2,CPU3, connected each to the other through a system bus 5. The several units are timed by a timing unit 6. CPU0 comprises a microprocessor 7 or MPU0, an address managing unit 9 or MMU0, a local memory 8 or LM0, an interface and arbitration unit 10, a local arbitrator 13 and an address translation unit 8B. The microprocessor 7 communicates with the local memory and with the interface unit 10 by means of a local bus 11. The microprocessor 7 has access to the system bus, through the interface unit 10, for receiving from and forwarding information to the other CPUs, and for referencing the local memory of the other CPUs or peripheral control units connected to the system bus, such as a controller 20 for disk unit 21 or secondary memories, a controller 22 for a display 23 and keyboard 24, a communication line controller 25, a controller 26 for a printer 27. Unit 10, together with corresponding units in the other CPUs, arbitrates access to the system bus by the several CPUs and manages the communication protocol on the system bus. The other CPUs of the system may obtain access, through the interface unit 10, to the local bus 11 of CPU0 and from there to the local memory 8. The address management unit 9, shown in Fig. 1 as an entity separate from processor 7, may be incorporate as an integral part of processor 7. For instance this is the case if processor 7 consists in an integrated microprocessor manufactured by the US firm MOTOROLA and marketed with the code MC68030. In addition to the address management unit 9 (MMU0) CPU0 comprises an address translation unit 8B coupled to the local memory 8. It further comprises a physical page 8C, named trash page and referenced by a predetermined pysical page address, which is preferably the same for all the processors (for instance the address 0). The addressing of local memory 8 is performed by a physical addresses, received through the local bus 11 either from the address management unit 9 or from the interface and arbitration unit 10. In case a real address is put on the local bus (hence a global data address), this address is detected as a global data address and converted in a physical address by the translation unit 8B coupled to the local memory 8. The translation unit 8B is initialized at system switching on, so as to convert the received real addresses in the address of the trash page, with the exception in case of some predetermined real addresses, used to reference "Kernel" global data, for which a 1 to 1 translation is provided (that is the real address is identical to the physical one). Subsequently, in a way which will be considered in the following, the contents of the translation unit 8B are changed so as to convert some of the real addresses to addresses of physical pages other than the trash page. The other CPUs of the system have an architecture identical to the one of CPU0. In the system of Fig. 1, the addresses in output from the MMUs of the several CPUs, have the format shown in Figure 2. Intentionaly such addresses are not referenced as physical addresses because they may either be effective physical addresses, or real addresses, which require a further conversion to physical addresses. A physical or real address, in output from the MMU of any one of the CPUs comprises 32 bits (bits 0-31). The most significant bits, respectively referenced as I (Internal Space, bit 31), PN (for Processor Number, bit 29,30) and G (for Global, bit 28) define the nature of the space addressed by bits 0-27. Bit 31, depending on its level true or false, conceptually distinguishes between two spaces; an internal space (bit 31=1) and an external space (bit 31=0). Within the external space (bit 31=0), bits 29,30 identify, depending on their level, the memory space (that is the local memory) of one of the several CPUs 0,1,2,3. Within the local memory space, bit 28 asserted indicates that the referenced space is a "global space" for storing global data; bit 28 deasserted indicates that the referenced space is a local space for storing local information. Bit 31 asserted indicates that the addressed space is internal that is within the resources of the same CPU where the address is generated. If bits 29,30 are both deasserted and bit 31 is asserted the selected internal space is the one of the local memory and within this space bit 28, depending on its level, references a local or global space. If at least one of bits 29,30 is asserted, the referenced internal space is generically a "register space": bits 0-28 or some of them are used to reference one among a plurality of resources other than the local memory. Bit 28, in addition to identifying a global space (bit 28=1) as opposed to a local space (bit 28=0) has another important function: when asserted it indicates that the address to which it pertains is a "real address" and must be converted in a physical address for referencing the several local memories. The conversion operation is peformed in autonomous way by each CPU, through the related translation unit (such as unit 8B in CPU0). Bits from 27 to 12 of each address are a physical or real page address (depending on bit 28 being false or true) and bits from 11 to 0, are an "offset" (invariant in the conversion of an address from logical to real and from real to physical one) which references a byte of information within a 4 Kbytes page. It is clear that by means of this address format a CPU may reference, through the related MMU, an entry of its own local memory (internal space) or an entry of any one of the other local memories (external space) which are seen as distributed and shared memory resources. The selection of an internal memory space may be performed through the local bus, without affecting the system bus. The selection of an external space is performed through the local bus and the interface unit of the agent CPU, the system bus, the interface unit and the local bus of the CPU related to the destination local memory. The previously mentioned patent applications, in particular EP-A-0320607 and SN 89120433.1, describe in detail the circuits which perform these operations. In case of global data write, the operation is performed jointly in all the local memories. The global data addressing, both for read and write operations, is performed with the real address which locally, just upstream of each local memory is converted in a physical address by the address translation unit coupled to each local memory. The management of the local memories, which in the whole form a distributed and shared memory, is performed, as known, by means of a main memory management program or MMMS, based on a set of sofware tables, linked in a hierarchical data structure. Figure 3 shows such tables and their linking in schematics. These tables are obviously stored in memory and, in view of the specific context of the invention, for each of them it is indicated if it is local (LOCAL) or global (GLOBAL), that is replicated in each of the local memories. The memory space needed for storing such tables is allocated by the supervisor system, at initialization, in a predetermined physical space, other than the trash page. The first table 30 named PROC.T.E is basically a list of processes (in Fig. 3 the generical processes PROC#X,PROC#Y,PROC#Z are shown) which have been created for execution in the system (by means of system primitives which in the case of UNIX V are FORK and EXEC). Each process, referenced by an identifier (Process ID) has a pointer to a data region named P-REGION. The P-REGION contains information related to the virtual address space used by the process (space bases) that is to the regions of addresses used by the process. In figure 3, P-REGIONs 31,32,33 are shown respectively connected to processes #X,#Y,#Z. A first region, named TEXT, is for storing instructions executed by the process. A second region, named DATA is for storing data used and/or created by the process. A third region, named STACK is for storing transient information used in the course of process execution. A fourth or more regions (if present), named SHM (shared memory) is/are for storing global data. For each one of these regions or segments there is a data structure in the table P-REGION. This data structure defines the virtual address base of the segment and a pointer to a further table named REGION. Figure 3 shows REGION tables 34,35,36,37. Tables PROC.T.E. and P-REGION contain information which may be used and tested by more processors in differing processors. This information is a global data and therefore these tables are replicated in each one of the local memories in a shared memory segment of the "Kernel". This segment is allocated in a predetermined memory space whose physical address coincide with the real address. The REGION table related to each virtual segment of the process contains information as to the size and nature of the segment and a pointer to a second table or list named R-LIST (tables 38,39 of Fig. 3). The R-LIST defines, in terms of "displacement", the virtual addresses of the page sets which form the segment. Each address refers to a further table PTE (page table entry, tables 40,41,42,43 of Fig. 3). This table contains the physical page address which correspond to each logical address and which is assigned by the MMMS. Other information is further contained such as the location of the data referenced by the physical/logical address on a disk or swap file as well as the status of the related memory page (valid if data are effectively stored in memory or invalid). Tables REGION, R-LIST and PTE have the character of information specific of the process which they describe. Therefore the are local data, stored only in the local memory of the processor where the process is active. As it will be described in the following the table REGION related to a shared memory segment contains further a pointer to a global data structure which the system uses to coordinate the use of the shared memory segment in the several CPUs. This data structure is an essential feature of the present invention. The conventional operation of an operating system with the above described data structures related to non shared segments is as follows. When a new process is created in a processor by a FORK system call, the operating system adds, in the table PROC.T.E, a new process identifier and related pointer, builds up a new P-REGION for the new process, a new REGION and a new R-LIST for each segment of the process and a new PTE table, where the physical pages are tagged as missing (invalid). The effective allocation of physical pages to the process, the compilation of the PTE tables with physical page addresses and their validation, are performed, page by page, on demand. The operating system further loads the possible references to a mass storage (disk) and a context register, contained in the MMU related to the processor. All the MMU entries are tagget as invalid. In fact, by the previous operations a certain memory space has been reserved, without filling it with valid contents. At this point the process may be started. The processor, where the MMU has been so preset, controls the reading of a first instruction of the TEXT segment at a first virtual address. This address is received by the MMU. Since an invalid contents corresponds to this entry, the MMU generates an error signal (Page fault) which call for supervisor intervention. The supervisor may ascertain the reason of the error signal by means of the contex register contents and the already mentioned linked tables. Therefore it reads the first text page from a secondary storage and load it in an available physical page of local memory, whose physical address is caused to be related to the virtual address of the first text page. The PTE entry corresponding to the virtual page address is loaded with the corresponding physical page address and with a valid page indicator. Then the process may be restarted and proceeds until the generation of a virtual address for which there is no correspondence with a valid physical address. This causes a retriggering of the "page fault handling" mechanism. It must be noted that the above described operations are performed at local processor level, without affecting the system bus, except for read operations from secondary storage and global data table write operations. The above described operations occurr in the handling of text, data and stack segments. In the case of the shared memory segment SHM, the system operates in a new and innovative way, according to the present invention. Figure 4 shows in schematics, the tables used, in accordance with the invention, for managing shared memory segments, and the links of such tables. In this case a plurality of processes listed in table PROC.T.E (in Fig.4 processes PROC#I,PROC#M,PROC#N are shown) may share the same memory segment SHM. To manage this segment the system uses a new global table comprising a fixed size portion 44 SHM-DS (for Shared Memory-Data Structure) and a variable size portion GSD (for Global Segment Descriptor). In the SHM-DS table, information is stored related to the features of the memory segment intended for storing shared data. The following information is specifically mentioned: A) N pointers (46,47,48,49) as many as the CPUs in the system (4 in the described embodiment). Each pointer references a local table REGION 50,51,52,53, each table being specific to a CPU. Each REGION table points to a local R-LIST 54...57. B) Information related to the user who has created the shared segment, the user group to which the user pertains, segment access permissions (who and in which manner has access to the segment), number of users actively using the segment, segment size. C) A code "key-t" which identifies the container function of the segment, say the data which have to be stored in the segment. Each of the local REGIONs contains the information already considered with reference to the TEXT,DATA,STACK segments. In addition it contains information as to the number of user which are using the region. The local R-LISTs, related to the SHM segment, are functionally identical to those related to the TEXT,DATA,STACK segments. The format of the global segment descriptor GSD 45 is shown in Fig. 5 and comprises an identification header HD and one entry E1,E2,E3, for each logical page address of the segment. Each entry contains a page real address RA corresponding to a page logical address, a status bit GS, which defines the related page as global or local, a status bit for each CPU, S0,S1,S2,S3 which defines for each CPU if the page is valid or invalid and a swap area address SWA, where in case the information contained in the related page has to be saved. Table GSD points, through tables SHM-DS,REGION,R-LIST, as shown in Fig. 4 to four local tables PTE 58,59,60,61. Each one of tables 58,59,60,61 is for storing a physical page address corresponding to each virtual page address. In addition to these tables, there is also a global table which is simply a list RALIST 62 (fig. 4) of real addresses used in association with global segments which have been created and are in existance, as well as a table 63 (KEYLIST) which establishes a relation between each global segment key and global segment identification code or shm-id. The shared memory identifier shm-id enables to directly point to the structure SHM-DS. The operation of the system by means of these data structures is the following. When a new process is created by a system call and a new data structure is created, describing the process, the table PROC.T.E. is updated first. If the new process requires the use of a shared segment a system primitive, named shm-get is activated. The flow performed by such primitive is summarized in a sequence of bloks shown in Fig.10. This primitive checks if a shared segment having the required features and functionalities is already existing. This check is performed by means of the KEY LIST (block 100). If the shared segment does not exist (block 101), the data structure SHM-DS (which is a global table, and is therefore replicated) is built up, to describe the new segment. A local REGION is built up in each CPU to provide a local description of the new segment; the SHM-DS table and the REGION tables are linked each other through pointers (block 102). In addition a table SD is allocated as global table (hence replicated in the local memory of each CPU). Table GDS is provided with the due heading, corresponding to the segment key or shm-id. The size of the table is defined as a function of the size of the segment to be described (block 103). In this phase, table GSD is empty, except for the heading. It is initialized or compiled at a subsequent phase. It must be noted that no memory space is allocated, except the one needed by the REGION local tables and by the global tables SHM-DS and GSD. The KEYLIST is updated with the new pair KEY/shm-id related to the created shared segment (block 104). Thus a new segment is nominally created. The use of such segment is performed by means of a primitive shm-at which invokes the connection of the segment to a user process. Figure 11 is a flow diagram of the operations performed by such primitive, which are shown as a concatenation of blocks. By means of this primitive, the PROC.T.E entry of the requesting process is connected, through the P-REGION and in conventional way) to the REGION which locally describes the shared segment (block 105). This means that if the requesting process I is executed in the CPU0, it will be connected to REGION 50, built up in CPU0, whilst a requesting process N. executed in the CPU1, will be connected to REGION 51, built up in CPU1 (Fig. 4). Both REGION tables 50,51, are linked to the same table SHM-DS 44. Further, the first time the primitive shm-at is performed in a CPU for connecting the segment, the table R-LIST and the table PTE are built-up in the local memory of the CPU where the connection is performed (block 106). It is further tested, in the CPU only which connects the segment, if memory space is available for the physical allocation of the shared segment (block 107). Once verified that the memory space is available, as free space of the working memory and/or as a memory space already containing information which can be swapped, thus freeing the space, this space is booked in terms of required number of pages, but not allocated (block 108). Then segment GSD is compiled with a series of real addresses choosen among those which have not been used, on the basis of the list RALIST, which is updated (block 109). The allocation of physical memory space is made only on demand, owing to the "page fault" mechanism. Initially the tables R-LIST and PTE linked to the REGION tables are loaded with information defining the several physical pages as invalid or missing (no physical page address is given, block 106). Subsequently, as the physical pages are allocated on demand to store information identified by virtual page addresses and related real addresses, the relation between real page address and physical address is established. The physical addresses so assigned are then written in the translation memory 8B for locally converting the real addresses in physical addresses. In table GSD the pages are all set missing (bit SO,S1,S2,S3 invalid) and the status bit GS is meaningless (block 109). In the REGION table related to the CPU where the first connection of the shared segment is performed, the field reserved to indicate the number of current users of the shared segment, initially empty, is incremented by one. The same occurs for a field in the SHM-DS structure, which has the same function at system level (block 110). It is reminded here that the shm-at primitive connects a shared segment to a process but does not allocate a physical memory space to the process. Allocation is made on demand, by the page fault mechanism, suitably modified. Before considering this aspect it is advisable to consider the case of shared segment generation when the segment is already existing, and its connection to another process. A) If a generic process requests, with the shm-get primitive, the creation of a shared segment and this segment already exists and is defined by the same KEY and the same SHM-ID, the primitive makes nothing more than supplying the process with information enabling it to perform the connection, that is to execute the shm-at primitive (Fig.11 block 111). B) If a generic process requests, with the shm-at primitive, the connection of an already existing segment, the segment being already connected to another process in the same CPU, the system selects, in the structure SHM-DS, the address of the region REGION in the same CPU where the requesting process is operating and connect the P-REGION of the requesting process to this REGION (block 105, Fig.11). Then the REGION field which defines the number of segment current users is incremented by one, as well as the corresponding field of the SHM-DS structure (block 110). This implies that more processes operating on the same shared segment can use differing virtual addresses for reference to the shared segment, because the base of the virtual addresses is stored in the P-REGION, there being a P-REGION per process, whilst several differing P-REGIONSs point to the same REGION. It is now considered how the page fault mechanism, therefore the Main Memory Management System MMMS operates to allocate physical pages in case of shared pages. The operations performed by the page fault handling mechanism are shown in the flow diagram of figures 12,13. The first time a program active in a CPU (for instance CPU0) seeks to have access (by a virtual address) to a shared segment page (this operation is certainly proceded by execution of the primitives shm-get and shm-at, the first generating the table REGION in the local memory of each CPU, the second generating the tables R-LIST,PTE in the local memory of CPU0), the related MMU generates a page error signal. Therefore the memory management system MMMS is activated. By means of the already described tables, in particular GSD table, it can be detected that the page is for a shared segment and it does not exist in any one of the local memories (bits S0,S1,S2,S3 invalid in GSD table, blocks 112,113,114,115). The MMMS system then selects a free memory page and loads the related physical address in the PTE table (block 116). It further validate the page status, both in PTE table and in GSD table (by setting to 1 the related status bit S0, block 117). Eventually the contents of MMU are updated whith the relation virtual address/physical address (block 118). In this case, since the page is valid in one CPU only (CPU0), it is treated as local information and the related physical address is written in the MMU. Bit 28, which characterizes the information as global or local is set to 0. Any subsequent access operation to the same page, by the same program occurs without activation of the page fault mechanism. If another program, active in the same CPU, attempts to have access to the same page (in compliance with access limitations, for instance read only) the access occurs normally without activation of the page fault mechanism, unless a differing virtual address (sinonym) is used for the same information. In this case, the page fault mechanism is again activated and once ascertained that the page already exists in the same CPU (block 115), after having checked that the page is not yet global (block 119) and is referenced by the physical address stored in the PTE table, the MMU entries are updated to provide the new relation virtual address sinonym/physical address (block 120). Should be detected that the page has already become global, the MMU would be loaded with the real address instead of the physical one (block 121). Now, if a program active in a CPU other than the previously considered one (CPU0) seeks to access the same page of shared segment, the MMU related to said other CPU generates a page error signal. Therefore in this CPU, hereinafter referred to as requesting CPU, the MMMS system is activated and through the already considered tables it may ascertain (block 115) that the page is already present in the local memory of another CPU (CPU0 which for the following is referenced as owing CPU). The requesting CPU then requests that the page be converted from local to global hence be replicated in all local memories, in case using the trash page. To this purpose the requesting CPU, by means of its MMMS, selects a real address, among those already booked and written in table GSD and assigns it to the requested logical page. Then it finds a free physical page within the local memory and loads the corresponding physical address in the translation memory 8B coupled to its own local memory, at the translation memory entry defined by the assigned real address. The physical address is also written in the PTE table. The status of this page, in the tables which reference it (PTE,GSD), is set invalid, to prevent its use (block 122). Once these operations are performed, the requesting CPU sends a message to the owning CPU and requests that the requested page be moved to the global space (block 123). This page is referenced through the location of its description in the GSD table. Then the owning CPU performs the following operations: finds the referenced page through the table GSD, checks that it effectively owns the page and through the REGION finds the virtual address of the page. updates the MMU tables by changing the physical address with the corresponding real one, in which bit 28 is set to 1 and characterize the page as global (block 124). loads the physical address (obtained from its own PTE table) in its own translation unit 8B, at the entry referenced by the real address of the page (block 125). performs a sequence of read and write operations so as to locally copy the full page (block 126). By the write operation, (global data write) a replication is requested in the local memory of the other CPUs. It must be noted that all CPUs other than the requesting one and the owning one, perform this operation in the trash page, because in their translation memory 8B the contents corresponding to the entry defined by the real page address have not been modified and are still those loaded at initialization, say the trash page address. updating of GSD table by setting to one the bit GS related to the page (block 127). Once these operation are performed, the owning CPU sends a message to the requesting CPU and notifies that the page has been replicated (block 128). The requesting CPU, once this message is received, updates the status bit, related to its own local memory, in the GSD table, validates the page in its own PTE table, updates the contents of its own MMU with the real address of the page and restarts the program who requested the page (block 129). The CPUs others than the owning and requesting one, do not update the related status bit in the GSD table and leave invalid the page which is replicated in their local memory. In fact, for these CPUs, the page has been loaded in the trash page and may be cancel led at any moment by overlaying it with another page which is written in the trash page. Once the page is made global, any data modification within the global page performed by the owning CPU or the requesting CPU, is performed and replicated in all local memories, in the trash page, the case being. If a third CPU, requires access to the same shared page for a generic process, obviously after connection of the shared segment by the shm-at primitive, the page fault mechanism detects, through the GSD table, that the page is global but locally invalid (block 130). It performs, for the reasons which will be considered later, a further test, on the PTE table, and/or by reading the translation memory 8B, and detects if the page physical address corresponding to the real address is the trash page address or another one (blocks 131,132). If the physical address is other than the trash one, this means that the page is already present in the local memory. Therefore it simply validate it, by setting to 1 the status bit related to the page and the new CPU, in the GSD table (block 133). On the contrary, if the physical page address is the trash page one, it selects a free physical page, loads the physical address of such page in the translation memory 8B, at the entry defined by the real address of the page to be loaded and requests to the one of the CPU which currently has right to write in the global page, that the page be read an rewritten (blocks 122,123). In this way the page is locally rewritten in the two CPUs which already have it and at the same time is replicated in the local memory of the third CPU. It may be noted that a shared or global segment, in the course of its use by a plurality of processors consists in a plurality of physical pages some of which are global, hence replicated in the local memory of the CPUs, which have requested them, others of which are local and present in only one of the local memories, not necessarily the same local memory for all the local pages. The situation is shown by way of example in Fig. 6 which shows the status of GSD table, compiled to describe the status of a virtual segment comprising pages defined by real addresses 1,2,3,4,5. The pages having real address 1,2,3 are global (GS=1), replicated in the local memory of CPU0,1,2,3 and used, hence valid, by one or more processes active in CPU 1,2,3, in CPU 0,1,2 and CPU 0,1 respectively. The page with real address 1 is not used in CPU 0, hence is locally invalid. It may be physically present and can be used at any time, if not loaded in the trash page. The presence of the page depends on the previous history of the page as it will be explained. The same considerations are applicable to the page having real address 2, in CPU3, and to the page having real address 3 in both CPU2 and CPU3. The page having real address 4 is local and present only in the local memory of CPU2 (GS=0,S2=1). The page having real address 5 is local and present only in the local memory of CPU0 (GS=0, S0=1). In this way the pages of real address 4 and 5 are treated as local, need physical memory space in one local memory only and their modification by write operation does not require system bus access operation. Having shown as a page of a shared segment may be converted from local page to global page, dynamically, that is at "run time" and selectively replicated in the local memory of the CPUs, which have requested it, whilst for the other CPUs, the replication is performed in a physical trash page, it may be considered as the opposite operation, conversion from global to local, is performed. In the operating systems, there are two commands which enable to exit from or end a process or to disconnect a segment from a process. They are the exit and detach commands. The first one is implicit: at the end of a process the operating system causes the exit from the process. The second is explicit command, which controls the disconnection of a segment. In particular, in those operating systems where a shared segment is provided, there is a specific command shm-dt which controls the disconnection of a shared segment. When in a generical CPUN a process ends, the command shm-dt decrements by one the number of users stored in the structure SHM-DS and in the REGION table related to CPUN and tests if in the REGION table the users number has become zero. If they are still users, the GSD table is not modified. If for CPUN the number of users is zero, the GSD table is updated by setting to 0 the status bit related to CPUN for all those pages of the segment which are global (GS=1). The pages which where local are kept valid, even if no more used by CPUN, because they are pages of a shared segment and potentially they may be requested by other processes in other CPUs. For the global pages which are invalidated, the relation physical address/real address in the translation memory 8B is left unchanged, as well as the status of the page in table PTE. As a consequence the invalidated pages continue to be present in the local memory and continue to be updated if global write operations are caused to occur by other processors. However, the CPUN may use such space at any time, assigning it to the allocation of other information if the need arise. This is performed simply by changing the relation real address/physical address in the translation memory SB and causing the real address to be converted in the trash page physical address. The previous physical address is assigned to a new segment. These considerations explain why a CPU, before requesting replication of a page which is global, but locally tagged as invalid, must test if the page is already present and usable. Resuming the description of the local invalidation phase of global pages, it is further tested if due to such updating the pages which were global remain valid, all of them or some of them only, in one CPU only, named receiving CPU. If this condition is not met, the pages continue to be treated as global. If this condition is met for at least one page, the CPUN signals to the receiving CPU that this second one is the last to use one or more pages of the shared segment and that such pages have to be converted in local pages. Therefore the receiving CPU get access in turn to the GSD table to change bit GS (global page indicator) from 1 to zero for all pages which remain of esclusive use by the receiving CPU. It further replaces the real address with the related physical address in the MMU for the pages converted to local. The physical address is obtained from the translation memory 8B coupled to the local memory related to the receiving CPU. There is no need for the receiving CPU to signal the other CPUs that the physical pages allocated to that or to those global pages may be freed, because they were already entitled to do so, by trashing the unused global pages in the trash page. In this way some or even all the pages of the shared segment, previously global and replicated, cease to be treated as such and return to be treated and addressed as local to one CPU (even if shared by a plurality of processes within the same CPU). When in the last CPU using pages of the shared segment, the last process using the shared segment ends, the segment consists in local pages only, even if they may be distributed in several CPUs. Liberation of these local pages and the disconnection of the shared segment are performed with explicit disconnection request RMID (Remove shared memory identifier). This means that all the global and local data structures which have been created to describe the shared segment (SHM-DS,REGION,R-LIST,PTE,GSD) and related pointers, are cancelled after having previously saved in a swap area the contents of the segment, if so required. To better show the advantages of the invention and the way in which a shared segment changes from a state of global pages to a state of local pages, figures 7,8,9 provide an example. Departing from the state shown in Fig.6, which shows the situation at a time TO, it may be assumed that at a subsequent time T1, the last process ends which uses the segment in the CPU0. Thus, bit SO related to the pages having real address 2,3 is set to 0 (Fig. 7) and the related memory space in CPU0 becomes free (usable for other purpose). The page having real address 5 was already local. Therefore the related bit S0 is left valid and the page remains available. The page having real address 3 was global but used in CPU0 and CPU1 only. Therefore it becomes a local page of CPU1 (bit GS is set to 0) and the related memory space becomes available in all CPUs, except CPU1, for other purposes. The page having real address 2, which was used by CPU0,CPU1 and CPU2 was global and remains global. The physical memory space used by this page in CPU0 continues to be used for allocation of the page but is potentially available, on demand and at any time, for other purpose. At a time T2, subsequent to T1 (Fig. 8) the processes actives in CPU1 and using the segment, have their end. Then even page 2, which was global, is converted to local. At a time T3 subsequent to T2 (Fig. 9) the process actives in CPU2 and using the segment have end. Page 1, which was global, is converted to local and it is the only one still in use. Most of the physical memory space previously used to store the several, concurrently used pages of the segment, is available. This before the shared segment ceases to be used, that is before a time T4 at which the processes using the segment in CPU3 have their end and the segment may be disconnected and removed from memory. Most of the pages, even if used in differing CPUs are selectively replicated or treated as local, without incurring in the overheads resulting from their handling as global. From the previous description it appears that all the operations of dynamic allocation and deallocation of global data are performed, in the several CPUs, by the processors contained therein, which processors, suitably controlled by instruction streams, constitute logical means which together with memory tables, and among them table GSD, and by examination of their contents, control the execution of the several desribed phases. In this context, the trash page, combined with the translation memory 8B is an essential element which allows for the execution of global write operations, that is write operations controlled jointly in all local memories but actually performed in useful way, selectively in any subset of the local memories. It is further clear that the preceding description relates to a preferred embodiment of system and method in accordance to the invention and that several changes can be made. In particular, the use of a physical memory page for the trash page, even if preferred is not necessary. It is possible to use an "abstract" page, that is a page which is not comprised in the effective memory space, and materially substitute the page with circuits which simulate its existance and avoid generation of overmemory signals when the page is addressed. Even the functions performed by the several primitives in the generation and modification of the tables which describe the several processes and in the generation of the messages among the several CPUs, may be assigned in a different way, as a function of operating system constraints and functionalites offered at hardware level, by the several CPUs. For example the conversion of a page, from local to global, by its replication, or the replication of a page which is already global in a CPU which previously had discarded it in the trash page, may be performed by the requesting CPU, rather than the owning CPU and by means of direct memory access (DMA) circuits.

Claims: Multiprocessor system having distributed shared resources and dynamic and selective global data replication, comprising: a system bus (5) a plurality of CPUs (CPU0, CPU1, CPU2, CPU3), each comprising a processor (7), a local memory (8), a memory management unit (MMU,9) coupled to said processor for converting virtual information page addresses generated by said processor into addresses having a bit field which characterizes the address as real address and related to a page of global data, which needs to be replicated in the local memory of all said CPUs, or as physical address and related to a page of local data, an interface unit (10), connected to said system bus and enabling the exchange of information among said CPUs, through said system bus, an address translation unit (8B), coupled to said local memory for converting said real addresses, received from either said memory management unit or said system bus through said interface unit, into physical addresses referencing entries of said local memory, a memory table (GSD,45) replicated in the local memory of all said CPUs, and storing information which for each data page of data segment of data which may be shared by a plurality of processes in said plurality of processors defines if said data page is global that is valid in a plurality of said CPUs or local, that is valid in one CPU only, in which of said CPU the data page is valid and a real address to be used for referencing said data page, a trash page (8C) in said local memory of all said CPUs, having a predetermined physical address, said address translation unit, in all said CPUs, being initialized for converting a set of said real addresses into said predetermined trash page physical address, first logic means in a first CPU among said CPUs, for performing a page fault procedure which responsive to an indication of missing page generated by the related memory management unit, references said memory table in the local memory related to said first CPU to detect if said missing page is valid in another second CPU among said CPUs and, in the affirmative, allocates a physical page of the local memory in said first CPU for storing said missing page, modifies the contents of the related address translation unit in said first CPU so as to reference said allocated physical page when a predetermined real address is used to reference said missing page and requests said second CPU to replicate said missing page, valid in said second CPU, as a global data page at said predetermined real address, second logic means in all CPUs, which responsive to said request from said first CPU copies said missing page valid in said second CPU at said predetermined real address as a global data page, wherein said missing page is replicated in a physical page other than said trash page in the local memory of said first CPU and those CPUs whose address translation unit contents have been modified so as to reference a page other than said trash page, and said missing page is replicated in trash page for all other CPUs when said predetermined real address is received by the address translation unit of each CPU, and third logic means in all CPUs which modifies the information stored in said corresponding memory table to indicate that said predetermined real address to be used for referencing said missing page is global and is valid in said first CPU. System as in claim 1, comprising fourth logic means in a third CPU among said CPUs, for detecting, at the end of a process executed in said third CPU, if a global data page is no more needed in said third CPU but is still valid in at least two other CPUs, for modifying, in the affirmative, the information stored in said memory table of all CPUs to indicate that said no more needed global data page is invalid in said third CPU and for modifying the contents of the address translation unit in said third CPU, when memory space is needed in said third CPU, so as to reference said trash page, when the real address referencing said no more needed global data page is received by said address translation unit in said third CPU. A method for the dynamic and selective allocation of replicated global data pages in a multiprocessor system comprising: a system bus (5), a plurality of CPUs (CPU0, CPU1,CPU2,CPU3), each comprising a processor (7), a local memory (8), a memory management unit (MMU,9) coupled to said processor for converting virtual information page addresses generated by said processor into addresses having a bit field which characterizes the address as real address and related to a page of global data, which needs to be replicated in the local memory of all said CPUs, or physical address and related to a page of local data, an interface unit (10), connected to said system bus and enabling the exchange of information among said CPUs, through said system bus, an address translation unit (8B), coupled to said local memory for converting said real addresses, received from either said memory management unit or said system bus through said interface unit, into physical addresses referencing entries of said local memory, the method comprising the following steps: initializing said address translation unit in all said CPUs, for converting a set of real addresses into a predetermined physical address of a trash page (8C), generating in each CPU for a data segment of data which may be shared by a plurality of processes in said plurality of processors a replicated memory table (GSD,45) which for each data page defines if said page is global, that is valid in a plurality of said CPUs or local, that is valid in one of said CPUs only, in which of said CPUs said page is valid, and a real address to be used for referencing said data page, detecting, by reading said memory table, if a shareable data page requested by a process active in a first CPU among said CPUs and missing in said first CPU is valid in another second CPU among said CPUs and in the affirmative allocating a physical page of the local memory in said first CPU, for storing said missing page, modifying the contents of said address translation unit in said first CPU so as to reference said allocated physical page when a predetermined real address is used to reference said missing page, requesting by said first CPU that said missing page valid in said second CPU, be replicated as global data page, replicating said missing page, valid in said second CPU, as global data page at said predetermined real address, wherein said missing page is replicated in a physical page other than said trash page in the local memory of said first CPU and those CPUs whose address translation unit contents have been modified so as to reference a page other than said trash page, and said missing page is replicated in trash page for all other CPUs when said predetermined real address is received by the address translation unit of each CPU, and modifying in all CPUs the information stored in said memory table to indicate that said predetermined real address to be used for referencing said missing page is global and is valid in said first CPU. The method of claim 3 further comprising the steps of: detecting, at the end of a process in a third CPU among said CPUS, if a global data page used in said process is no more needed by said third CPU but is still used in a plurality of CPUs, and in the affirmative modifying the information stored in said memory table of all CPUs to indicate that said no more needed data page is invalid in said third CPU modifying the contents of said address translation unit in said third CPU so as to reference said trash page when the real address referencing said no more needed data page is received by said address translation unit in said third CPU.

Inventors: LEONARDI CARLO, LEONARDI, CARLO
Applicants: BULL HN INFORMATION SYST, BULL HN INFORMATION SYSTEMS ITALIA S.P.A.
Application year: 1990
Main classification: G06F12
IPC codes: G06F15, G06F12