Cross tagging to data for consistent recovery

A system for consistent data recovery, including a storage area network (SAN) of initiator nodes and target nodes, wherein initiator nodes issue I/O requests and target nodes respond to I/O requests, the SAN being represented logically as a plurality of consistency groups of nodes, G1, . . . , Gn, each consistency group representing at least one logical storage unit (LU), each LU acting as a target node within the SAN, at least one host device, each host device acting as an initiator within the SAN, each host device including a transmitter for issuing I/O requests to at least one LU, and each host device being associated with a host device agent, the host device agent including an interceptor for intercepting I/O requests issued by the host device, and a router for forwarding the intercepted I/O requests to a data protection appliance, a data protection appliance (DPA) acting as both an initiator node and a target node within the SAN.

FIELD OF THE INVENTION

The present invention relates to data protection and disaster recovery and more specifically to tracking and managing storage systems with dynamically changing data.

BACKGROUND OF THE INVENTION

Computer data is vital to today's organizations, and a significant part of protection against disasters is focused on data protection. As solid-state memory has advanced to the point where cost of memory has become a relatively insignificant factor, organizations can afford to operate with systems that store and process terabytes of data.

Conventional data protection systems include tape backup drives, for storing organizational data on a periodic basis. Such systems suffer from several drawbacks. First, they require a system shutdown during backup, since the data being backed up cannot be used during the backup operation. Second, they limit the points in time to which the organization to recover. For example, if data is backed up on a daily basis, there may be several hours of lost data in the event of a disaster. Third, the data recovery process itself takes a long time.

Another conventional data protection system uses data replication, by creating a copy of the organization's data on a secondary backup storage system, and updating the backup occur with changes. The backup storage system may be situated in the same physical location as the production storage system, or in a physically remote location. Data replication systems generally operate either at the application level, or at the file system level, or at the data block level.

Current data protection systems try to provide continuous data protection, which enable the organization to roll back to any specified point in time within a recent history. Continuous data protection systems aim to satisfy two conflicting objectives, as best as possible; namely, (i) minimize the down time, in which the organization data is unavailable, during a recovery, and (ii) enable recovery as close a possible to any specified point in time within a recent history.

Continuous data protection typically uses a technology referred to as “journaling”, whereby a log is kept of changes made to the backup storage. During a recovery, the journal entries serve as successive “undo” information, enabling rollback of the backup storage to previous points in time. Journaling was first implemented in database systems, and was later extended to broader data protection.

Because of their complex and massive configurations, large enterprise data systems with multiple production sites are often protected by distributing data replication over multiple protection systems. Although each individual protection system serves to restore the data units that it replicates, the need often arises for restoring a consistent image across all of the enterprise data units. For example, many production sites may share common databases, and the need may arise for generating a consistent image of the databases across all sites.

Unless a single data protection system replicates all of the enterprise data, there is currently no solution for restoring a consistent image across the enterprise without having to shut down the production sites.

SUMMARY OF THE DESCRIPTION

The present invention concerns systems and methods for recovering a consistent image of a data processing application, where the data processing is performed across more than one node of a storage area network (SAN). The SAN includes a plurality of consistency groups, where each group is a logical representation of (i) at least one logical storage unit (LU) at a production site, (ii) at least one host device at the production site that accesses the LUs, (iii) a data protection appliance (DPA) at the production site, and (iv) a replication site including LUs, host devices and DPAs which are counterparts to those at the production site, used to replicate the production site data. The replication site DPA maintains a journal of write transactions to the production site LUs, which can be used to undo the transactions and thereby restore the production site LUs to an earlier state.

The present invention uses tags to mark specific points in time in a journal, and the replication DPA of each consistency group can rollback the production site LUs to the states they were in at the time of a tag. The present invention also uses protection agents that process I/O requests from host devices, and that quiesce (i.e., halt, pause) the host devices, by temporarily stopping returning acknowledgements to issued I/O requests.

By arranging for the host devices in the various consistency groups to quiesce and remain quiesced within a common time interval, be it a small time interval, the present invention is able to cross tag the consistency groups in an overall consistent manner. By rolling back the source storage systems to their states at the times of the cross tags, a consistent image across all consistency groups is recovered.

As such, the present invention is able to overcome limitations of prior art data protection systems, especially those used for large enterprises, and to obtain a consistent image of all enterprise data units, without requiring shut down of production sites, or even interruption of production site data processing, while maintaining continuous data protection.

There is thus provided in accordance with a preferred embodiment of the present invention a system for consistent data recovery, including a storage area network (SAN) of initiator nodes and target nodes, wherein initiator nodes issue I/O requests and target nodes respond to I/O requests, the SAN being represented logically as a plurality of consistency groups of nodes, G1, . . . , Gn, each consistency group representing at least one logical storage unit (LU), each LU acting as a target node within the SAN, at least one host device, each host device acting as an initiator within the SAN, each host device including a transmitter for issuing I/O requests to at least one LU, and each host device being associated with a host device agent, the host device agent including an interceptor for intercepting I/O requests issued by the host device, and a router for forwarding the intercepted I/O requests to a data protection appliance, a data protection appliance (DPA) acting as both an initiator node and a target node within the SAN, the DPA including a receiver for receiving a current I/O request forwarded by an agent router for a host device, a router for forwarding the current I/O request to a replication facility, an ACK transmitter for sending an acknowledgement for an I/O request to an agent, wherein the agent router is operable to halt forwarding further host device I/O requests until the acknowledgement for a current I/O request is received from the DPA, and to resume forwarding after the acknowledgement for the current I/O request is received; and a tag initiator for issuing an instruction for the replication facility to tag a consistency group at a current point in time, and a replication facility including a receiver for receiving I/O requests forwarded by the DPA router, and a data recoverer for restoring the LUs to a tagged state, based on I/O requests received by the DPA receiver, the system further including a DPA manager operable to send requests to the DPAs of G1, . . . , Gn, (r1) to stop their ACK transmitters sending acknowledgements for I/O requests to the host device agents of G1, . . . , Gn, and (r2) to tag G1, . . . , Gn.

There is further provided in accordance with a preferred embodiment of the present invention a method for consistent data recovery, including issuing requests from a data protection appliance (DPA) manager to at least one DPA within at least one consistency group, G1, . . . , Gn, (r1) to stop sending acknowledgements of I/O requests to host device agents of G1, . . . , Gn, and (r2) to tag G1, . . . , Gn, wherein a tag is used to mark a consistency group at a specific point in time, wherein the consistency groups G1, . . . , Gn represent logical parts of a storage area network, and each consistency group G1, . . . , Gn represents a DPA, at least one host device, at least one LU and at least one replication facility, the replication facility being operable to restore the at least one LU to its former state at the time of the tag, and wherein each host device is associated with a host device controller that is operable to forward the host device I/O requests, halt such forwarding when it does not receive an acknowledgement of a current I/O request from a DPA, and resume such forwarding after it does receive an acknowledgement of the current I/O request from the DPA.

There is yet further provided in accordance with a preferred embodiment of the present invention a computer-readable storage medium storing program code for causing a data protection appliance (DPA) manager to issue requests to at least one DPA within at least one other consistency group, G1, . . . , Gn, (r1) to stop sending acknowledgements of I/O requests to host device agents of G1, . . . , Gn, and (r2) to tag G1, . . . , Gn, wherein a tag is used to mark a consistency group at a specific point in time, wherein the consistency groups G1, . . . , Gn represent logical parts of a storage area network, and each consistency group G1, . . . , Gn represents a DPA, at least one host device, at least one LU and at least one replication facility, the replication facility being operable to restore the at least one LU to its former state at the time of the tag, and wherein each host device is associated with a host device agent that is operable to forward the host device I/O requests, halt such forwarding when it does not receive an acknowledgement of a current I/O request from a DPA, and resume such forwarding after it does receive an acknowledgement of the current I/O request from the DPA.

There is additionally provided in accordance with a preferred embodiment of the present invention a system for data protection, including a network represented logically as a plurality of consistency groups, G1, . . . , Gn, each consistency group representing at least one host device for issuing I/O requests, and each host device being associated with a host device controller for processing I/O requests issued by the host device, a data protection appliance (DPA), communicating with the at least one host device, including a quiesce controller operable to cause the at least one host device controller to halt processing I/O requests and to cause the at least one host device controller to resume processing I/O requests, and a tag initiator for marking a specific consistency group at a specific point in time, the system further including a DPA manager operable to send requests to the DPAs of G1, . . . , Gn, (r1) via their quiesce controllers, to cause the host device controllers of G1, . . . , Gn to halt processing I/O requests, and (r2) to initiate tags in G1, . . . , Gn.

There is moreover provided in accordance with a preferred embodiment of the present invention a method for data protection, including issuing requests from a data protection appliance (DPA) manager, to at least one DPA within at least one consistency group, G1, . . . , Gn, the request including (r1) to cause host device controllers of G1, . . . , Gn to halt processing I/O requests, and (r2) to initiate tags in G1, . . . , Gn, wherein a tag is used to mark a consistency group at a specific point in time, wherein the consistency groups G1, . . . , Gn represent logical parts of a network, and each consistency group G1, . . . , Gn represents a DPA and at least one host device, and wherein each host device is associated with a host device controller that processes the host device I/O requests, and that can halt such processing and that can resume such processing.

There is further provided in accordance with a preferred embodiment of the present invention a computer-readable storage medium storing program code for causing a data protection appliance (DPA) manager to issue requests to at least one DPA within at least one consistency group, G1, . . . , Gn, the requests including (r1) to cause host device controllers of G1, . . . , Gn to halt processing I/O requests, and (r2) to initiate tags in G1, . . . , Gn, wherein a tag is used to mark a consistency group at a specific point in time, wherein the consistency groups G1, . . . , Gn represent logical parts of a network, and each consistency group G1, . . . , Gn represents a DPA and at least one host device, and wherein each host device is associated with a host device controller that processes the host device I/O requests, and that can halt such processing and that can resume such processing.

There is yet further provided in accordance with a preferred embodiment of the present invention a system for data recovery to a crash consistent state of data of a plurality of consistency groups stored in a storage sub-system, including a storage area network (SAN) of initiator nodes and target nodes, wherein initiator nodes issue I/O requests and target nodes respond to I/O requests, the SAN including at least one storage subsystem acting as a SAN target node, including at least one addressable physical storage unit; and at least one controller operable to provide access to data stored in the at least one addressable physical storage unit, to at least one host acting as a SAN initiator node through at least one logical storage unit (LU), each LU having an identifier, and at least one host acting as a SAN initiator node, operable to issue I/O requests to the at least one LU through at least one host device, each host device having an identifier at least one data processing unit, each data processing unit including a receiver for receiving I/O requests issued by at least one host to at least one LU, a router for forwarding a current I/O request to a data protection facility, and a transmitter for sending an acknowledgement for an I/O request to a host device of the at least one host, wherein each of the at least one host is operable to halt processing further I/O requests through a host device until the acknowledgement is received from the data processing unit for a current I/O request, and to resume processing I/O requests through a host device after the acknowledgement is received, at least one consistency group, each consistency group being a logical entity including an identifier, at least one of the LU identifiers, and at least one of the host device identifiers, a tag initiator for issuing an instruction for the data protection facility to store a consistency group identifier and a tag identifier, and a data protection facility including a receiver for receiving I/O requests forwarded by the at least one router, and a journal processor for storing write I/O requests issued to at least one LU, each write I/O request including an identifier of the LU to which the I/O request was issued and an identifier of the sequential order of the write request, and a data recoverer for processing the data stored by the journal processor and the data stored in the at least one LU, or a copy thereof, so to enable at least one SAN initiator node to process the at least one LU, or a copy thereof, in a state it was in at at least one point in time in the past, wherein one of the data processing units of the system further includes a data protection manager operable to send requests, via the transmitter, to at least one data processing unit, (r1) to halt host devices of at least one consistency group handled by that data processing unit, and (r2) to tag a consistency group.

The following definitions are employed throughout the specification and claims.BACKUP SITE—a facility where replicated production site data is stored; the backup site may be located in a remote site or at the same location as the production site;CONSISTENCY GROUP—a basic logical entity for which data protection services, such as replication, tagging and journaling, are provided by a DPA; a consistency group includes (i) at least one logical storage unit for a source side storage system that is to be protected, (ii) corresponding logical units for a backup site, and (iii) at least one logical unit used for journaling at the backup site;DPA—a computer or a cluster of computers that serve as a data protection appliance, responsible for data protection services including inter alia data replication of a storage system, and journaling of I/O requests issued by a host computer to the storage system;HOST—at least one computer or networks of computers that runs at least one data processing application that issues I/O requests to one or more storage systems; a host is an initiator with a SAN;HOST DEVICE—an internal interface in a host, to a logical storage unit;IMAGE—a copy of a logical storage unit at a specific point in time;INITIATOR—a node in a SAN that issues I/O requests;JOURNAL—a record of write transactions issued to a storage system; used to maintain a duplicate storage system, and to rollback the duplicate storage system to a previous point in time;LOGICAL UNIT—a logical entity provided by a storage system for accessing data from the storage system;LUN—a logical unit number for identifying a logical unit;PHYSICAL STORAGE UNIT—a physical entity, such as a disk or an array of disks, for storing data in storage locations that can be accessed by address;PRODUCTION SITE—a facility where one or more host computers run data processing applications that write data to a storage system and read data from the storage system;SAN—a storage area network of nodes that send and receive I/O and other requests, each node in the network being an initiator or a target, or both an initiator and a target;SOURCE SIDE—a transmitter of data within a data replication workflow, during normal operation a production site is the source side; and during data recovery a backup site is the source side;STORAGE SYSTEM—a SAN entity that provides multiple logical units for access by multiple SAN initiatorsTARGET—a node in a SAN that replies to I/O requests;TARGET SIDE—a receiver of data within a data replication workflow; during normal operation a back site is the target side, and during data recovery a production site is the target side;WAN—a wide area network that connects local networks and enables them to communicate with one another, such as the Internet.

A system for consistent data recovery, including a storage area network (SAN) of initiator nodes and target nodes, wherein initiator nodes issue I/O requests and target nodes respond to I/O requests, the SAN being represented logically as a plurality of consistency groups of nodes, G1, . . . , Gn, each consistency group representing at least one logical storage unit (LU), each LU acting as a target node within the SAN, at least one host device, each host device acting as an initiator within the SAN, each host device including a transmitter for issuing I/O requests to at least one LU, and each host device being associated with a host device agent, the host device agent including an interceptor for intercepting I/O requests issued by the host device, and a router for forwarding the intercepted I/O requests to a data protection appliance, a data protection appliance (DPA) acting as both an initiator node and a target node within the SAN, the DPA including a receiver for receiving a current I/O request forwarded by an agent router for a host device, a router for forwarding the current I/O request to a replication facility, an ACK transmitter for sending an acknowledgement for an I/O request to an agent, wherein the agent router is operable to halt forwarding further host device I/O requests until the acknowledgement for a current I/O request is received from the DPA, and to resume forwarding after the acknowledgement for the current I/O request is received; and a tag initiator for issuing an instruction for the replication facility to tag a consistency group at a current point in time, and a replication facility including a receiver for receiving I/O requests forwarded by the DPA router, and a data recoverer for restoring the LUs to a tagged state, based on I/O requests received by the DPA receiver, the system further including a DPA manager operable to send requests to the DPAs of G1, . . . , Gn, (r1) to stop their ACK transmitters sending acknowledgements for I/O requests to the host device agents of G1, . . . , Gn, and (r2) to tag G1, . . . , Gn. A method and a computer-readable storage medium are also described and claimed.

DETAILED DESCRIPTION

The present invention concerns systems and methods for achieving consistent data recovery across multiple data replication systems. The present invention makes novel use of timed quiescing to control host applications so that they all quiesce (i.e., pause, halt), and remain quiesced within a common time interval. Such a common time interval exists when one host application does not un-quiesce (i.e., resume, un-halt) before another one quiesces. The present invention also makes use of tagging to mark journals prior to expiration of such common time interval, even if the time interval is very short, thereby ensuring that the tags are consistent with one another.

As such, the present invention is able to obtain a consistent image of all enterprise data units, without requiring shut down of production sites, or interruption of production site data processing.

Reference is now made toFIG. 1, which is a simplified illustration of a data protection system100, in accordance with a preferred embodiment of the present invention. Shown inFIG. 1are two sites; Site I, which is a production site, on the right, and Site II, which is a backup site, on the left. Under normal operation the production site is the source side of system100, and the backup site is the target side of the system. The backup site is responsible for replicating production site data. Additionally, the backup site enables rollback of Site I data to an earlier pointing time, which may be used in the event of data corruption of a disaster, or alternatively in order to view or to access data from an earlier point in time.

During normal operations, the direction of replicate data flow goes from source side to target side. It is possible, however, for a user to reverse the direction of replicate data flow, in which case Site I starts to behave as a target backup site, and Site II starts to behave as a source production site. Such change of replication direction is referred to as a “failover”. A failover may be performed in the event of a disaster at the production site, or for other reasons. In some data architectures, Site I or Site II behaves as a production site for a portion of stored data, and behaves simultaneously as a backup site for another portion of stored data. In some data architectures, a portion of stored data is replicated to a backup site, and another portion is not.

The production site and the backup site may be remote from one another, or they may both be situated at a common site, local to one another. Local data protection has the advance of minimizing data lag between target and source, but remote data protection has the advantage is being robust in the event that a disaster occurs at the source side.

The source and target sides communicate via a wide area network (WAN)128, although other types of networks are also adaptable for use with the present invention.

In accordance with a preferred embodiment of the present invention, each side of system100includes three major components coupled via a storage area network (SAN); namely, (i) a storage system, (ii) a host computer, and (iii) a data protection appliance (DPA). Specifically with reference toFIG. 1, the source side SAN includes a source host computer104, a source storage system108, and a source DPA112. Similarly, the target side SAN includes a target host computer116, a target storage system120, and a target DPA124.

Generally, a SAN includes one or more devices, referred to as “nodes”. A node in a SAN may be an “initiator” or a “target”, or both. An initiator node is a device that is able to initiate requests to one or more other devices; and a target node is a device that is able t reply to requests, such as SCSI commands, sent by an initiator node. A SAN may also include network switches, such a fiber channel switches. The communication links between each host computer and its corresponding storage system may be any appropriate medium suitable for data transfer, such as fiber communication channel links.

In a preferred embodiment of the present invention, the host communicates with its corresponding storage system using small computer system interface (SCSI) commands.

System100includes source storage system108and target storage system120. Each storage system includes physical storage units for storing data, such as disks or arrays of disks. Typically, storage systems108and120are target nodes. In order to enable initiators to send requests to storage system108, storage system108exposes one or more logical units (LU) to which commands are issued. Thus, storage systems108and120are SAN entities that provide multiple logical units for access by multiple SAN initiators.

Logical units are a logical entity provided by a storage system, for accessing data stored in the storage system. A logical unit is identified by a unique logical unit number (LUN). In a preferred embodiment of the present invention, storage system108exposes a logical unit136, designated as LU A, and storage system120exposes a logical unit156, designated as LU B.

In a preferred embodiment of the present invention, LU B is preferably used for replicating LU A. As such, LU B is generated as a copy of LU A. LU B is configured so that its size is identical to the size of LU A. Thus for LU A, storage system120serves as a backup for source side storage system108. Alternatively, as mentioned hereinabove, some logical units of storage system120may be used to back up logical units of storage system108, and other logical units of storage system120may be used for other purposes. Moreover, in certain embodiments of the present invention, there is symmetric replication whereby some logical units of storage system108are used for replicating logical units of storage system120, and other logical units of storage system120are used for replicating other logical units of storage system108.

System100includes a source side host computer104and a target side host computer116. A host computer may be one computer, or a plurality of computers, or a network of distributed computers, each computer may include inter alia a conventional CPU, volatile and non-volatile memory, a data bus, an I/O interface, a display interface and a network interface. Generally a host computer runs at least one data processing application, such as a database application and an e-mail server.

Generally, an operating system of a host computer creates a host device for each logical unit exposed by a storage system in the host computer SAN. A host device is a logical entity in a host computer, through which a host computer may access a logical unit. In a preferred embodiment of the present invention, host device104identifies LU A and generates a corresponding host device140, designated as Device A, through which it can access LU A. Similarly, host computer116identifies LU B and generates a corresponding device160, designated as Device B.

In a preferred embodiment of the present invention, in the course of continuous operation, host computer104is a SAN initiator that issues I/O requests (write/read operations) through host device140to LU A using, for example, SCSI commands. Such requests are generally transmitted to LU A with an address that includes a specific device identifier, an offset within the device, and a data size. Offsets are generally aligned to 512 byte blocks. The average size of a write operation issued by host computer104may be, for example, 10 kilobytes (KB); i.e., 20 blocks. For an I/O rate of 50 megabytes (MB) per second, this corresponds to approximately 5,000 write transactions per second.

System100includes two data protection appliances, a source side DPA112and a target side DPA124. A DPA performs various data protection services, such as data replication of a storage system, and journaling of I/O requests issued by a host computer to source side storage system data. As explained in detail hereinbelow, when acting as a target side DPA, a DPA may also enable rollback of data to an earlier point in time, and processing of rolled back data at the target site. Each DPA112and124is a computer that includes inter alia one or more conventional CPUs and internal memory.

Preferably, for additional safety precaution, each DPA is a cluster of such computers. Use of a cluster ensures that if a DPA computer is down, then the DPA functionality switches over to another computer. The DPA computers within a DPA cluster communicate with one another using at least one communication link suitable for data transfer via fiber channel or IP based protocols, or such other transfer protocol. Preferably, one computer from the DPA cluster serves as the DPA leader. The DPA cluster leader coordinates between the computers in the cluster, and may also perform other tasks that require coordination between the computers, such as load balancing.

In the architecture illustrated inFIG. 1, DPA112and DPA124are standalone devices integrated within a SAN. Alternatively, each of DPA112and DPA124may be integrated into storage system108and storage system120, respectively, or integrated into host computer104and host computer116, respectively. Both DPAs communicate with their respective host computers through communication lines such as fiber channels using, for example, SCSI commands.

In accordance with a preferred embodiment of the present invention, DPAs112and124are configured to act as initiators in the SAN; i.e., they can issue I/O requests using, for example, SCSI commands, to access logical units on their respective storage systems. DPA112and DPA124are also configured with the necessary functionality to act as targets; i.e., to reply to I/O requests, such as SCSI commands, issued by other initiators in the SAN, including inter alia their respective host computers104and116. Being target nodes, DPA112and DPA124may dynamically expose or remove one or more logical units.

As described hereinabove, Site I and Site II may each behave simultaneously as a production site and a backup site for different logical units. As such, DPA112and DPA124may each behave as a source DPA for some logical units, and as a target DPA for other logical units, at the same time.

In accordance with a preferred embodiment of the present invention, host computer104and host computer116include protection agents144and164, respectively. Protection agents144and164intercept SCSI commands issued by their respective host computers, via host devices to logical units that are accessible to the host computers. In accordance with a preferred embodiment of the present invention, a data protection agent may act on an intercepted SCSI commands issued to a logical unit, in one of the following ways:Send the SCSI commands to its intended logical unit.Redirect the SCSI command to another logical unit.Split the SCSI command by sending it first to the respective DPA. After the DPA returns an acknowledgement, send the SCSI command to its intended logical unit.Fail a SCSI command by returning an error return code.Delay a SCSI command by not returning an acknowledgement to the respective host computer.

A protection agent may handle different SCSI commands, differently, according to the type of the command. For example, a SCSI command inquiring about the size of a certain logical unit may be sent directly to that logical unit, while a SCSI write command may be split and sent first to a DPA associated with the agent. A protection agent may also change its behavior for handling SCSI commands, for example as a result of an instruction received from the DPA.

Specifically, the behavior of a protection agent for a certain host device generally corresponds to the behavior of its associated DPA with respect to the logical unit of the host device. When a DPA behaves as a source site DPA for a certain logical unit, then during normal course of operation, the associated protection agent splits I/O requests issued by a host computer to the host device corresponding to that logical unit. Similarly, when a DPA behaves as a target device for a certain logical unit, then during normal course of operation, the associated protection agent fails I/O requests issued by host computer to the host device corresponding to that logical unit.

Communication between protection agents and their respective DPAs may use any protocol suitable for data transfer within a SAN, such as fiber channel, or SCSI over fiber channel. The communication may be direct, or via a logical unit exposed by the DPA. In a preferred embodiment of the present invention, protection agents communicate with their respective DPAs by sending SCSI commands over fiber channel.

In a preferred embodiment of the present invention, protection agents144and164are drivers located in their respective host computers104and116. Alternatively, a protection agent may also be located in a fiber channel switch, or in any other device situated in a data path between a host computer and a storage system.

What follows is a detailed description of system behavior under normal production mode, and under recovery mode.

In accordance with a preferred embodiment of the present invention, in production mode DPA112acts as a source site DPA for LU A. Thus, protection agent144is configured to act as a source side protection agent; i.e., as a splitter for host device A. Specifically, protection agent144replicates SCSI I/O requests. A replicated SCSI I/O request is sent to DPA112. After receiving an acknowledgement from DPA124, protection agent144then sends the SCSI I/O request to LU A. Only after receiving a second acknowledgement from storage system108will host computer104initiate another I/O request.

When DPA112receives a replicated SCSI write request from data protection agent144, DPA112transmits certain I/O information characterizing the write request, packaged as a “write transaction”, over WAN128to DPA124on the target side, for journaling and for incorporation within target storage system120.

DPA112may send its write transactions to DPA124using a variety of modes of transmission, including inter alia (i) a synchronous mode, (ii) an asynchronous mode, and (iii) a snapshot mode. In synchronous mode, DPA112sends each write transaction to DPA124, receives back an acknowledgement from DPA124, and in turns sends an acknowledgement back to protection agent144. Protection agent144waits until receipt of such acknowledgement before sending the SCSI write request to LU A.

In asynchronous mode, DPA112sends an acknowledgement to protection agent144upon receipt of each I/O request, before receiving an acknowledgement back from DPA124.

In snapshot mode, DPA112receives several I/O requests and combines them into an aggregate “snapshot” of all write activity performed in the multiple I/O requests, and sends the snapshot to DPA124, for journaling and for incorporation in target storage system120. In snapshot mode DPA112also sends an acknowledgement to protection agent144upon receipt of each I/O request, before receiving an acknowledgement back from DPA124.

For the sake of clarity, the ensuing discussion assumes that information is transmitted at write-by-write granularity.

While in production mode, DPA124receives replicated data of LU A from DPA112, and performs journaling and writing to storage system120. When applying write operations to storage system120, DPA124acts as an initiator, and sends SCSI commands to LU B.

During a recovery mode, DPA124undoes the write transactions in the journal, so as to restore storage system120to the state it was at, at an earlier time.

As described hereinabove, in accordance with a preferred embodiment of the present invention, LU B is used as a backup of LU A. As such, during normal production mode, while data written to LU A by host computer104is replicated from LU A to LU B, host computer116should not be sending I/O requests to LU B. To prevent such I/O requests from being sent, protection agent164acts as a target site protection agent for host Device B and fails I/O requests sent from host computer116to LU B through host Device B.

In accordance with a preferred embodiment of the present invention, target storage system120exposes a logical unit176, referred to as a “journal LU”, for maintaining a history of write transactions made to LU B. referred to as a “journal”. Alternatively, journal LU176may be striped over several logical units, or may reside within all of or a portion of another logical unit. Preferably, DPA124includes a journal processor180for managing the journal.

Journal processor180functions generally to manage the journal entries of LU B. Specifically, journal processor180(i) enters write transactions received by DPA124from DPA112into the journal, by writing them into the journal LU, (ii) applies the journal transactions to LU B, and (iii) updates the journal entries in the journal LU with undo information and removes already-applied transactions from the journal. As described below, with reference to FIGS.2and3A-3D, journal entries include four streams, two of which are written when write transaction are entered into the journal, and two of which are written when write transaction are applied and removed from the journal.

Reference is now made toFIG. 2, which is a simplified illustration of a write transaction200for a journal, in accordance with a preferred embodiment of the present invention. The journal may be used to provide an adaptor for access to storage120at the state it was in at any specified point in time. Since the journal contains the “undo” information necessary to rollback storage system120, data that was stored in specific memory locations at the specified point in time may be obtained by undoing write transactions that occurred subsequent to such point in time.

Write transaction200generally includes the following fields:one or more identifiers;a time stamp, which is the date & time at which the transaction was received by source side DPA112;a write size, which is the size of the data block;a location in journal LU176where the data is entered;a location in LU B where the data is to be written; andthe data itself.

Write transaction200is transmitted from source side DPA112to target side DPA124. As shown inFIG. 2, DPA124preferably records the write transaction200in four streams. A first stream, referred to as a DO stream, includes new data for writing in LU B. A second stream, referred to as an DO METADATA stream, includes metadata for the write transaction, such as an identifier, a date & time, a write size, a beginning address in LU B for writing the new data in, and a pointer to the offset in the do stream where the corresponding data is located. Similarly, a third stream, referred to as an UNDO stream, includes old data that was overwritten in LU B; and a fourth stream, referred to as an UNDO METADATA, include an identifier, a date & time, a write size, a beginning address in LU B where data was to be overwritten, and a pointer to the offset in the undo stream where the corresponding old data is located.

In practice each of the four streams holds a plurality of write transaction data. As write transactions are received dynamically by target DPA124, they are recorded at the end of the DO stream and the end of the DO METADATA stream, prior to committing the transaction. During transaction application, when the various write transactions are applied to LU B, prior to writing the new DO data into addresses within the storage system, the older data currently located in such addresses is recorded into the UNDO stream.

By recording old data, a journal entry can be used to “undo” a write transaction. To undo a transaction, old data is read from the UNDO stream in a reverse order, from the most recent data to the oldest data, for writing into addresses within LU B. Prior to writing the UNDO data into these addresses, the newer data residing in such addresses is recorded in the DO stream.

The journal LU is preferably partitioned into segments with a pre-defined size, such as 1 MB segments, with each segment identified by a counter. The collection of such segments forms a segment pool for the four journaling streams described hereinabove. Each such stream is structured as an ordered list of segments, into which the stream data is written, and includes two pointers—a beginning pointer that points to the first segment in the list and an end pointer that points to the last segment in the list.

According to a write direction for each stream, write transaction data is appended to the stream either at the end, for a forward direction, or at the beginning, for a backward direction. As each write transaction is received by DPA124, its size is checked to determine if it can fit within available segments. If not, then one or more segments are chosen from the segment pool and appended to the stream's ordered list of segments.

Thereafter the DO data is written into the DO stream, and the pointer to the appropriate first or last segment is updated. Freeing of segments in the ordered list is performed by simply changing the beginning or the end pointer. Freed segments are returned to the segment pool for re-use.

When a write transaction is received, journaling is thus advanced as indicated in TABLE I below.

TABLE IEntering a write transaction in the journalStep 1The new data is written at the end of the DO stream, assuming aforward write direction, and corresponding metadata is writtenat the end of the DO METADATA stream.Step 2Data is read from the beginning of the DO stream, andcorresponding metadata is read from the beginning of the DOMETADATA stream.Step 3Old data to be overwritten is read from LU B. The location andsize of such old data is determined from the DO METADATAstream.Step 4The old data is written at the end of the UNDO stream, andcorresponding metadata is written at the end of the UNDOMETADATA stream.Step 5The new data read at Step 2 is written into LU B, and thebeginning and end pointers of the DO and DO METADATAstreams are moved appropriately.

Conversely, during a rollback to undo a write transaction, the above operations are reversed, as indicated in TABLE II below.

TABLE IIUndoing a write transaction in the journalStep 1Read the data and metadata from the end of the UNDO andUNDO METADATA streams.Step 2Read from LU B the data that is to be overwritten. The locationand size of such data is determined from the UNDOMETADATA stream.Step 3Write the data from Step 2 at the beginning of the DO stream,and update the DO METADATA stream accordingly.Step 4Write the data from Step 1 to LU B, and update the beginningand end pointers of the UNDO and UNDO metadata streamsappropriately.

The following example, in conjunction withFIGS. 3A-3D, describes specific details of the journaling process, in accordance with a preferred embodiment of the present invention. A journal volume includes a plurality of segments from a segment pool, each segment including 20 data blocks.

Three write transactions are received, as indicated in TABLE III.

TABLE IIIExample Write TransactionsWriteLU BJournal LUIDTimelocationLengthlocation112/03/05LU B15 blocksSegment 1,10:00:00.00offset 57 blocksoffset 0212/03/05LU B20 blocksSegment 1,10:00:00.05offset 87 blocksoffset 15312/03/05LU B20 blocksSegment 3,10:00:00.18offset 12 blocksOffset 15
The following discussion describes four stages of journaling and data storage; namely,Stage #1: Enter the three write transactions as journal entries in the journal LU.Stage #2: Apply the first write transaction to LU B.Stage #3: Apply the second write transaction to LU B.Stage #4: Rollback the second write transaction, to recover data from an earlier point in time.

The write transaction with ID=1 is written to the first 15 blocks of Segment #1. The metadata corresponding to this transaction is written to the first block of Segment #2. The second write transaction with ID=2 is written to the last 5 blocks of Segment #1and the first 15 blocks of Segment #3. The metadata corresponding to this transaction is written to the second block of Segment #2. The third write transaction with ID=3 is written to the last 5 blocks of Segment #3and the first 15 blocks of Segment #4. The metadata corresponding to this transaction is written to the third block of Segment #2.

Thus at stage #1, the DO stream in memory includes a list of segments1,3,4; and a beginning pointer to offset=0 in Segment #1and an end pointer to offset=10 in Segment #4. The DO METADATA stream in memory includes a list of one segment, namely Segment #2; and a beginning pointer to offset=0 in Segment #2and an end pointer to offset=3 in Segment #2. The UNDO stream and the UNDO METADATA stream are empty. The journal and the four streams at the end of stage #1 are illustrated inFIG. 3A.

At stage #2 the write transaction with ID=1 is applied to LU B. New data to be written is read from the journal LU at the offset and length indicated in the DO METADATA; namely, 15 blocks of data located in blocks0-14of journal volume Segment #1. Correspondingly, old data is read from LU B at the offset and length indicated in the UNDO METADATA; namely, 15 blocks of data located in blocks57-71of LU B. The old data is then written into the UNDO stream in the journal LU, and the associated metadata is written into the UNDO METADATA stream in the journal LU. Specifically, for this example, the UNDO data is written into the first 15 blocks of Segment #5, and the UNDO METADATA is written into the first block of Segment #6. The beginning pointer of the UNDO data stream is set to offset=0 in Segment #5, and the end pointer is set to offset=15 in Segment #5. Similarly, the beginning pointer of the UNDO METADATA stream is set to offset=0 on Segment #6, and the end pointer is set to offset=1 in Segment #6.

At this point, the new data that was read from blocks0-14of journal LU Segment #1is written to blocks57-71of LU B. The beginning pointer for the DO stream is moved forward to block15of journal LU Segment #1, and the beginning pointer for the DO METADATA stream is moved forward to block1of journal LU Segment #2. The journal and the four streams at the end of stage #2 are illustrated inFIG. 3B.

At stage #3 the write transaction with ID=2 is applied to the storage system. As above, 20 blocks of new data are read from blocks15-19of journal LU Segment #1and from blocks0-14of journal LU Segment #3. Similarly, 20 blocks of old data are read from blocks87-106of LU B. The old data is written to the UNDO stream in the last 5 blocks of journal LU Segment #5and the first 15 blocks of journal LU Segment #7. The associated metadata is written to the UNDO METADATA stream in the second block of Segment #6. The list of segments in the UNDO stream includes Segment #5and Segment #7. The end pointer of the UNDO stream is moved to block15of Segment #7, and the end pointed of the UNDO METADATA stream is moved to block2of Segment #6.

Finally, the new data from blocks15-19of journal LU Segment #1and blocks0-14of journal LU Segment #3is written into blocks87-106of LU B. The beginning pointer for the DO stream is moved forward to block15of journal volume Segment #3, and the beginning pointer for the DO METADATA stream is moved forward to block2of journal LU Segment #2. Segment #1is freed from the DO stream, for recycling within the segment pool, and the list of segments for the DO stream is changed to Segment #3and Segment #4. The journal and the four streams at the end of stage #3 are illustrated inFIG. 3C.

At stage #4 a rollback to time 10:00:00.00 is performed. Since the write transaction with ID=3 was not applied yet, the only write transaction to be undone is the write transaction with ID=2. The last entry is read from the UNDO METADATA stream, the location of the end of the UNDO METADATA stream being determined by its end pointer. I.e., the metadata before block2of journal LU Segment #6is read, indicating two areas each of 20 blocks; namely, (a) the last 5 blocks of journal LU Segment #5and the first 15 blocks of journal LU Segment #7, and (b) blocks87-106of LU B. Area (a) is part of the UNDO stream.

The 20 blocks of data from area (b) are read from LU B and written to the beginning of the DO stream. As the beginning pointer of the DO stream is set to offset=15 of journal LU Segment #3, 5 blocks are written at the end of Segment #3, and the remaining 15 blocks are written to Segment #8. The end pointer for the DO stream is set to block15of Segment #8. The list of segments for the DO stream is changed to Segment #3, Segment #4and Segment #8. The metadata associated with the 20 blocks from area (b) is written to block3of Segment #2, and the end pointer of the DO METADATA stream is advanced to block4of Segment #2.

The 20 blocks of data in area (a) of the journal LU are then written to area (b) of the LU B. Finally, Segment #7is freed for recycling in the segment pool, the UNDO stream ending pointer is moved back to Segment #5of the journal LU, block15, and the UNDO METADATA stream ending pointed is moved back to Segment #6of the journal LU, block1. The journal and the four streams at the end of stage #4 are illustrated inFIG. 3D.

Thus it may be appreciated that the journal is thus used to rollback LU B to the state that it was in at a previous point in time. The journal is also used to selectively access data from LU B at such previous point in time, without necessarily performing a rollback. Selective access is useful for correcting one or more files that are currently corrupt, or for simply accessing old data.

TABLE IV below summarizes the behavior of the special protection components of system100during production mode. Reference is also made toFIG. 4, which is a simplified flowchart of a data protection method corresponding to TABLE IV.FIG. 4is divided into four columns. The leftmost column indicates steps performed by source side protection agent112, the middle left column indicates steps performed by source side DPA144, the middle right column indicates steps performed by target side DPA124, and the rightmost column indicates steps performed by target side protection agent164.

TABLE IVNormal Production Mode FunctionalitySystem ComponentBehaviorSource Side Agent 144Intercept SCSI commands issued to LU A bysource side host via Device A (step 404).Replicate write commands, and route writecommands to DPA (steps 408 and 412). Waitfor first acknowledgement, from DPA (step416), and then route replicate I/O command toLU A (step 420). Wait for secondacknowledgement, from storage system (step424), and then process next intercepted SCSIcommand (step 404).Source Side DPA 112Receive write command from agent (step 428).Format write command as write transaction, andsend to target DPA (step 428). In synchronousmode, wait for acknowledgement from targetDPA (step 432), and then sendacknowledgement to agent (step 436). Inasynchronous mode and in snapshot mode, sendacknowledgement to agent without waiting foracknowledgement from target DPA (step 436).Target Side DPA 124Receive write transaction from source DPA (step444). Enter write transaction in journal DO andDO METADATA streams (step 444), and sendback acknowledgement to source DPA (step448). Process journal entries by applying themto LU B, and enter undo information in UNDOand UNDO METADATA streams (step 440).Target Side Agent 164Fail SCSI commands issued to LU B (step 452).

Only steps with arrows connecting them inFIG. 4are necessarily sequential. Thus steps432and436, which do not have arrows connecting them, are not necessarily sequential. In synchronous mode these steps are sequential, but in asynchronous mode and in snapshot mode they are not sequential. In particular, DPA112may send an acknowledgement to protection agent144before receiving an acknowledgement back from DPA124.

It is also noted inFIG. 4that the steps performed by target side DPA124include two non-sequential groups; namely, (i) step440, and (ii) steps444and448.

Recovery mode is generally triggered as a result of a disaster at the source side. The source side data may become corrupt, or may not exist at all. In such case, after recovery is completed at the backup site, a user may perform a failover operation by switching the roles of the production site and backup site. The original backup site becomes a current production site, and the original production site becomes a current backup site. Alternatively, recovery mode can be triggered without a failover, in order to access data from a previous point in time.

While in recovery mode, target site DPA124continues to receive new write transactions from DPA112and enter them at the ends of the DO and DO METADATA streams. However, unlike production mode behavior, DPA124stops applying journal entries received from DPA112to LU B. Instead, DPA124uses the UNDO stream of the journal to rollback LU B, as described hereinabove.

During recovery, after or possibly before rollback of LU B is complete, a user may wish to access data from the target site. To this end, protection agent164stops failing I/O requests issued by host computer160and begins redirecting them to DPA124. The processing of data by host computer160during recovery mode is referred to as “target side processing (TSP)”.

To manage TSP write commands that are received by target side DPA124, journal processor180preferably uses two additional data streams, referred to as TSP DO and TSP METADATA streams. When a TSP write command is received by DPA124, it is entered at the end of the TSP DO stream and the end of the TSP DO METADATA stream. Since TSP writes relate to the state of LU B after the rollback is complete, the TSP DO stream writes are only applied to LU B after rollback is complete. Journal processor180applies TSP writes to LU B in a way similar to the way it applies write transactions deceiver from DPA112; namely, journal processor180maintains the undo information for each write applied to LU B, in TSP UNDO and TSP UNDO METADATA streams.

When TSP read commands are received by target site DPA124, DPA124returns the data to be read by identifying locations of the read command, and finding the most recent TSP write command or commands that were applied at these locations. The data is searched for (i) first in the TSP DO stream, and (ii) then in the journal UNDO data that was not yet applied to LU B and (iii) finally, if the data was not found in (i) and (ii), then the data is taken from LU B itself. Preferably, in order to perform such a search efficiently, DPA124generates and stores in its memory a virtual image of the UNDO METADATA storage locations by using an efficient data structure, such as a binary search tree.

After rollback is completed, the TSP writes that were performed during the rollback are applied to LU B, and DPA124begins applying TSP writes synchronously; i.e., TSP writes are applied to LU B when they are received by DPA124, without keeping them in the TSP DO stream. As such, when a read command is received after rollback is complete, it is sent directly to LU B instead of being redirected through DPA124.

TABLES V and VI below summarize the behavior of the special protection components of system100during recovery mode, before and after the rollback is complete, in accordance with a preferred embodiment of the present invention. Reference is also made toFIGS. 5 and 6, which are simplified flowcharts of data protection methods corresponding to TABLES V and VI, respectively.FIGS. 5 and 6are divided into four columns. The leftmost column indicates steps performed by target side protection agent164, the middle left column indicates steps performed by target side DPA124, the middle right column indicates steps performed by source side DPA112, and the rightmost column indicates steps performed by source side protection agent144.

TABLE VRecovery Functionality prior to Completion of RollbackSystem ComponentBehaviorTarget Side Agent 164Intercept SCSI commands issued to LU B (step576). Redirect commands to DPA (step 580).Target Side DPA 124Use UNDO stream of journal to roll back targetstorage system (step 540). Continue receivingwrite transactions from DPA 112 and enterthese transactions into DO and DO METADATAstreams without applying them to LU B (step548). Enter TSP write transactions to TSP DOand TSP DO METADATA streams (step 564).Create a virtual image, to reply to readcommands issued during the recovery process(step 572).Source Side DPA 112As in production mode.Source Side Agent 144As in production mode.

TABLE VIRecovery Functionality after Completion of RollbackSystem ComponentBehaviorTarget Side Agent 164Intercept SCSI commands issued to LU B (step664). Redirect write transactions to DPA (step672), and route read commands directly to LU B(step 680).Target Side DPA 124Apply TSP write transactions to LU B, in thesame manner that write transactions receivedfrom DPA 112 are applied in production mode;i.e., by entering data into TSP UNDO and TSPUNDO METADATA streams (step 640). EnterDO information and write transactions receivedfrom DPA 112 into DO and DO METADATAstreams, without applying them to LU B (step644). Apply TSP write transactions to LU B asthey are received (step 656).Source Side DPA 112As in production mode.Source Side Agent 144As in production mode.

Reference is now made toFIG. 7, which is a simplified illustration of a time-line for tracking new processing of old data, in accordance with a preferred embodiment of the present invention.FIG. 7illustrates journal processor180bringing the timeline back to a previous time, TOLD, and journal processor180applying TSP writes to bring the timeline forward from time TCURRENT to time TNEW. As shown inFIG. 7, current data at time (1) is rolled back to old data at time (2). After rolling back the data to time (2), the rolled back data becomes the image upon which target side processing advances to new data at time (3); i.e., the target side processing is applied to data (2) and not to data (1).

The data at time (1) is a common image for LU A and LU B at the same point in time, TCURRENT. Similarly, the data at time (2) is a common image for LU A and LU B at time TOLD. Rolled back data at time (2) may be processed by TSP writes, while at the same time current data at time (1) is being processed by source side writes. As such, the data evolves along the path from time (2) to time (3) as it is processed by the target side, and along the path from time (2) to time (4) as it is processed by the source side. The data images at the source and target sides at time TNEW are thus different.

When the recovery process is completed, the user may (i) return to a normal production mode, or (ii) perform a failover by switching the replication direction. In case (i), LU B is rolled back to its state at time (2), and the write transactions along the path from (2) to (4) are applied to LU B, so as to bring LU B to the same image as LU A. Conversely, in case (ii), LU B is maintained at its state at time (3), and its data is copied from the target side to the source side so as to bring LU A to the same image as LU B.

It may be appreciated that after rolling back the UNDO data stream to LU B, the state of the target side storage is substantially identical to the state that LU A was in at an earlier point in time. However, after applying TSP writes, the state of LU B is then in a new state that is different from the earlier state of LU A. As such, in order to return to a normal production mode, and ensure that LU B is a copy of LU A, DPA124undoes the TSP writes that were written to LU B using the TSP undo stream, and then returns to its normal production mode and begins applying the data that was written into the DO stream. The DO stream includes all write transactions that were undone while LU B was rolled back. Additionally, the DO stream includes new journal entries that were received from DPA112while DPA was in recovery mode. Similarly, protection agent164returns to its production mode by beginning to fail I/O requests issued by host116.

Alternatively, the user want to perform a failover; i.e., to make LU B in its current state a production LU and ensure that LU A is a copy of LU B. In this case the write transactions in the DO stream that correspond to a point in time subsequent to the recovered point in time are ignored. Additionally, the TSP writes that were applied to LU B during the recovery process are applied to LU A. Thereafter, the replication direction changes. Specifically, DPA124and protection agent164begin behaving in accordance with source site behavior, and DPA112and protection agent144begin behaving in accordance with target site behavior.

It may be appreciated that in order to provide failover capability, in which the roles of the production site and the backup site are switched, it is desirable that the source side has the necessary system components to function as a target side, and vice versa. Thus, in a preferred embodiment of the present invention, the source side includes its own journal LU184and journal processor188, as indicated with dotted lines inFIG. 1.

In accordance with a preferred embodiment of the present invention, data protection is performed on “consistency groups”. A consistency group is a basic logical unit of replication for “write order fidelity” maybe guaranteed. Write order fidelity refers to the ability to replicate data to a backup site and keep the data in the same sequence as it was written at the production site. For many applications, write order fidelity is a critical requirement for consistency. If data is written in an incorrect sequence at the backup site, such applications may become corrupted at that site.

In a preferred embodiment of the present invention, a consistency group includes a set of one or more logical units at a production site, a set of one or more host devices at the production site, and a DPA at the production site. Preferably, the consistency group also includes a replication site with a corresponding set of logical units that are used for replicating the source side logical units, a corresponding set of host devices and a corresponding DPA. Additionally, a consistency group also includes at least one journal LU, in which journal data for the consistency group is written. For example, with reference toFIG. 1, a consistency group may include host device A, LU A and DPA112at the production site, Device B, LU B and DPA124at the replication site, and journal LUs176and184.

In a preferred embodiment of the present invention, write order fidelity is achieved within a consistency group by attaching a time stamp to every write transaction, as described hereinabove. Thus, with reference toFIG. 1, even if DPA124receives write transactions in an incorrect order, DPA124is able to re-order the write transactions based on their date & time stamps.

Large production systems may include multiple production sites and replication sites. An enterprise data system, for example, may be distributed across many host computers that write to different storage systems, through many switches. Typically, for such a complex SAN, there may not be a single node that receives all of the I/O operations.

Although complex SANs can be protected using multiple systems corresponding toFIG. 1, the need often arises to obtain a consistent image of all SAN targets at a certain point in time. For example, a database may be shared by two production sites, each with its own replication site, and the need may arise for a consistent image of the database across both sites.

Referring back toFIG. 1, in accordance with a preferred embodiment of the present invention, generating a consistent image maybe problematic when DPA112includes a cluster of computers, and when FC switch148connecting host computer104and storage system108includes more than one switch. As described hereinabove, use of a cluster of computers for a DPA serves to make a data protection system immune to failure of a DPA computer. Similarly, for the same reason of high-availability, more than one switch may connect host computer104and storage system108.

When DPA112includes more than one computer, different write transactions may arrive at different DPA computers. In this case, there may be clock differences between the DPA computers that destroy write order fidelity. To avoid destroying write order fidelity, preferably a consistency group is always handled by one specific computer within a DPA cluster. When there are more than one consistency group handled by a DPA cluster, however, the workload can be shared amount the computers within the cluster. As such, the problem of generating a consistent image of more than one consistency group arises even if the consistency groups are handled by one DPA cluster.

Reference is now made toFIG. 8, which is a simplified illustration of a system for cross-tagging consistency groups within a storage area network, for consistent data recovery, in accordance with a preferred embodiment of the present invention. Shown inFIG. 8are three representative consistency groups, G1, G2and G3. Group G1includes two production logical storage units, LU A1and LU A2, and two corresponding logical storage units, LU B1and LU B2, for replication. Group G1also includes internal host devices Device A1, Device A2, Device B1and Device B2corresponding to the logical storage units, and a pair of DPAs. Devices A1and A2are connected to corresponding protection agents, such as protection agent144ofFIG. 1. In accordance with a preferred embodiment of the present invention, the DPAs include a tag initiator and a quiesce controller, the functions of which are described hereinbelow with reference to methodsFIGS. 10 and 12. Group G2includes a production logical storage unit, LU C1, and a corresponding logical storage unit, LU D1, for replication. Group G2also includes internal host devices Device C1and Device D1corresponding to the logical storage units, and a pair of DPAs. Group G3includes a production logical storage unit, LU E1, and a corresponding logical storage unit, LU F1, for replication. Group G3also includes internal host devices Device E1and Device F1corresponding to the logical storage units, and a pair of DPAs. Devices C1, D1, E1and F1are connected to corresponding protection agents, and each DPA includes a tag initiator and a quiesce controller. The DPA of G1is designated as the “DPA manager”, the functionality of which is described hereinbelow with reference to methodFIGS. 10 and 12.

In general, it may be appreciated that logical storage units from different consistency groups may be shared among host computers. For example, a single host computer may write to LU A1, LU B1, LU C1and LU D1.

Referring back toFIG. 1, in accordance with a preferred embodiment of the present invention, DPA112may send a special write transaction, referred to as a “tag”, to DPA124, to mark a particular point in time. The tag may be initiated by a user of host computer104, or by DPA112itself. The tag is written in the journal DO METADATA stream, similar to other write transactions, but it has a different type. Normal write transactions are marked as “data write” type, and tag transactions are marked as “tag write” type. As DO METADATA stream journal entries are processed and applied to storage120, tags that are encountered are moved to the journal's UNDO METADATA stream. As such, when data recovery is performed to restore a tagged state, write transactions in the UNDO METADATA stream subsequent to the tag are undone.

Thus it may be appreciated that a user can use a tag to create a consistent snapshot at a given point in time, for a given consistency group. The user can give the tag a unique name that describes the point in time it is being applied. Subsequently, a backup facility can rollback the storage systems of a consistency group to that state they were in at the time of the tag. Referring toFIG. 8, LU A1and LU A2, for example, can be rolled back to the states they were in at the time of a tag initiated by the DPA in G1.

With reference toFIG. 1, it may further be appreciated that DPA112has the ability to place Device A into a standby mode, by not sending an acknowledgement to host computer104for I/O requests sent through Device A. As described hereinabove, DPA112can hold I/O requests issued by host computer104through Device A in abeyance, by not sending an acknowledgement to protection agent144. During such time period, an application running on host computer104and writing to LU A through Device A is quiesced; i.e., halted from issuing further I/O requests to storage system108.

Preferably, as a safeguard, protection agent144is programmed to disconnect itself from DPA112and end the state of quiescence, after a certain timeout period has elapsed or after a certain event has occurred. Such disconnection ensures that the production site can continue its data processing, and not have to shut down in the interim; in case, for example, communication between DPA112and protection agent144becomes malfunctional. It may be appreciated that after such a disconnection, it is necessary to copy data that was written directly to LU A without being sent via DPA112to LU B, to re-synchronize LU A and LU B. Alternatively, protection agent144may be programmed to not connect itself, thereby ensuring that no data is written to LU A without being replicated to LU B.

In accordance with a preferred embodiment of the present invention, a consistent image of an entire SAN is accomplished by quiescing and cross-tagging all DPA clusters within the SAN, as described hereinbelow.

Reference is now made toFIG. 9, which is a simplified illustration of a time line for consistent cross tagging, in accordance with a preferred embodiment of the present invention. Reference is also made toFIG. 10, which is a simplified flowchart of a method for consistent cross tagging, in accordance with a preferred embodiment of the present invention. Shown inFIG. 9is a graph with a vertical time axis, and a horizontal axis for DPA computers within consistency groups.

FIGS. 9 and 10refer to three DPA computers C1, C2and C3, which together form a DPA cluster. Computers C1, C2and C3from the DPA cluster service three consistency groups, G1, G2and G3, respectively.FIG. 10is divided into four columns. The two leftmost columns describe steps performed by computer C1, the middle right column describes steps performed by computer C2, and the rightmost column describes steps performed by computer C3. The steps performed by computer C1are preferably performed by two different processing threads, and are thus divided into two columns.

When a consistent image of G1, G2and G3is to be created, one of the DPA computers, referred to as the “DPA manager”, say C1, receives a cross-tag instruction (step1003). The DPA manager initiates a timer at a time T0, with an elapse time of T0+Δt (step1006), and sends quiesce and tag commands to computers C1, C2and C3(step1009). In accordance with a preferred embodiment of the present invention, the module that performs the quiesce and tag commands on C1(steps1012,1015,1018,1021,1024,1045and1048) runs on a different processing thread than the module that issues the commands (steps1003,1006,1009,1027,1030,1036,1039and1042). Thus, C1actually receives the command from the DPA manager at a time TB1, somewhat later than T0(step1012). However, it will be appreciated by those skilled in the art that the module that performs the quiesce and tag command on C1may also run on the same processing thread as the module that issues the command.

Each DPA computer that receives these commands (i) triggers a timer with a timeout value of Δt (steps1015,1054and1075), (ii) halts sending of acknowledgements to host devices associated with logical units that belong to the consistency group handled by the DPA computer (steps1018,1057and1078), and then (iii) initiates a tag (steps1021,1060and1081). If a DPA computer succeeds in performing (ii) and (iii) prior to elapse of the timeout Δt, it sends a confirmation to the DPA manager that the quiesce and tag commands were successful (steps1024,1063and1084). When the timeout interval Δt is exceeded (steps1045,1066and1087), or when an un-quiesce command is received from the DPA manager (step1042), whichever comes first, the DPA computer stops halting the host devices and starts sending acknowledgements again (steps1048,1069and1090). Preferably, while the various host computers are quiesced, I/O requests that are delayed are kept in a buffer for later application.

C1quiesces its own group G1host devices, and tags the current state of the storage units in G1at time TE1, as shown inFIG. 9and at step1021ofFIG. 10. C2receives the command from the DPA manager at time TB2, and initiates a timer with an elapse time of TB2+Δt, quiesces host devices associated with logical units of G2, and tags the current state of the storage units in G2at a time TE2, as shown inFIG. 9and at step1060ofFIG. 10. Similarly, C3receives its quiesce and tag command at time TB3, quiesces the host devices associated with logical units of G3, and tags the current states of storage units in G3at a time TE3, as shown inFIG. 9and at step1081ofFIG. 10. C1finishes creating its tag, and sends a confirmation back to the DPA manager, which is received at time TTAG1(step1024). Similarly, C2and C3each finish creating their tags and send confirmations to the DPA manager (steps1063and1084, respectively), which are received at times TTAG2and TTAG3, respectively.

It can be seen fromFIG. 9that there exists a common time interval during which all host devices are quiesced if and only if the last of the tag times TE1, TE2and TE3, occurs before the first of the un-quiesce times TB1+Δt, TB2+Δt and TB3+Δt. During the time interval between the last tag time and the first un-quiesce time all host devices are quiesced.

As shown inFIG. 9, if DPA manager receives the confirmations from the module performing the quiesce and tag command in C1, the DPA in G2and the DPA in G3within the timeout period Δt (steps1027and1036), then, since the DPA manager's timer was set prior to the other DPA computers' timers, the DPA manager can be certain that at least during the time period between TTAG3until the DPA manager's timeout elapses, all host devices associated with logical units of G1, G2and G3are quiesced. Thus, the DPA manager is certain that a consistent cross tagging across all consistency groups was successful (step1039). Otherwise, the DPA manager cannot be certain that there was a single point in time after all three groups G1, G2and G3were tagged but before any of them were un-quiesced; i.e., it cannot ascertain that
max(TE1,TE2,TE3)<min(TB1,TB2,TB3)+ΔΔt.(1)
Since the sequence of events ensures that T0<min(TB1, TB2, TB3), TE1<TTAG1, TE2<TTAG2and TE3<TTAG3, a sufficient condition for Equation (1) to hold is that
max(TTAG1,TTAG2,TTAG3)<T0+Δt.(2)
Equation (2) is the condition illustrated inFIG. 9.

In order to rollback to a consistent image across all consistency groups, G1should be rolled back to TTAG1, G2should be rolled back to TTAG2, and G3should be rolled back to TTAG3. The resulting image will be consistent across all consistency groups corresponding to the time TTAG3at which the last confirmation was received. After rollback to times TTAG1, TTAG2and TTAG3, and until such time that the first DPA computer is un-quiesced, all host devices associated with logical units of G1, G2and G3are quiesced, and the logical units of G1, G2and G3are rolled back to their states when the last write request was issued by the host devices.

Preferably, upon receiving confirmations from the DPA computers, the DPA manager sends an un-quiesce command to the DPA computers (step1042), so as to minimize the time the DPA computers halt the application(s) writing to their consistency group host devices. Alternatively, if the DPA manager does not send such un-quiesce command, then each DPA computer will stop halting its respective consistency group host devices when its own timer elapses.

The method described hereinabove assumes that the timeout interval Δt is substantially identical, for all DPA computers; i.e., that the number of clocks within the timeout interval is substantially the same. Referring toFIGS. 9 and 10, this assumption uses the same timeout interval Δt for the DPA manager and for computers C1, C2and C3at respective steps1006,1015,1054and1075. This assumption is generally true for small timeout intervals Δt. If this assumption is not justified, then an alternative embodiment of the present invention may be used instead, wherein the DPA manager waits until it receives a confirmation from the other DPA computers, without setting its own timer.

Upon receiving the last confirmation, the DPA manager cannot be certain that there was a time period in which all host devices associated with logical units of G1, G2and G3were quiesced. To resolve this, the DPA manager after receiving the last confirmation, sends an un-quiesce command to the DPA computers, as above. However, in this alternative embodiment each DPA computer that receives the un-quiesce command returns a true or false indicator, according to whether it was quiesced or un-quiesced when it received the DPA manager's un-quiesce command. If it was already un-quiesced, then its timeout period elapsed prior to receiving the DPA manager's un-quiesce command. If the DPA manager receives a return value of true from the DPA computers, it is certain that, at least at the point of time when it sent the un-quiesce command, all host devices associated with logical units of G1, G2and G3were quiesced, and thus the consistent cross-tagging succeeded. Otherwise, if it receives a return value of false from one or more DPA computers, then the consistent cross-tagging failed.

Although the alternative embodiment has the advantage that each DPA computer may have its own timeout period, and no assumption is made regarding the various DPA computer clocks, it has the disadvantage of requiring more time, and thus delaying the production site longer than the first embodiment. Thus if the cross-tag command is triggered, for example, by an external application, such as a database application, after the external application has performed its own quiesce command, then in the second embodiment such application has to halt its I/O requests until the other DPA computers report back to the DPA manager. In the first embodiment, such application only has to halt its I/O request until the DPA manager determines a success or a failure.

Reference is now made toFIG. 11, which is a simplified illustration of a time line for consistent cross tagging, in accordance with a preferred embodiment of the present invention. Reference is also made toFIG. 12, which is a simplified flowchart of a method for consistent cross tagging, in accordance with a preferred embodiment of the present invention. Similar toFIG. 9,FIG. 11also shows a graph with a vertical time axis, and a horizontal axis for DPA computers within consistency groups. Similar toFIG. 10,FIG. 12is also divided into four columns; namely, the two leftmost columns describe steps performed by computer C1, the middle right column describes steps performed by computer C2, and the rightmost column describes steps performed by computer C3. The steps performed by computer C1are preferably performed by two different processing threads, and are thus divided into two columns. In distinction toFIG. 10, however, the respective timeout periods Δt1, Δt2and Δt3at steps1215,1254and1278may be different. Additionally,FIG. 12includes different logic at steps1227,1230,1233and1236for determining success or failure of a consistent cross tag. Specifically, if all DPA computers send notifications to the DPA manager that they were quiesced when they received the DPA manager's un-quiesce command, then a consistent cross tag was obtained (step1230). If any of the DPA computers sends a notification to the DPA manager that it was already un-quiesced when it received the DPA manager's un-quiesce command, then a consistent cross tag was not obtained (step1236).

With reference toFIG. 11, if the respective notification times TNOTIFY1, TNOTIFY2and TNOTIFY3are each less than the timeout expirations1110,1120and1130, respectively, then a consistent cross tagging was obtained. Shown inFIG. 11is a situation wherein computer C3, marked FAILURE, receives the un-quiesce command from the DPA manager after its timeout already expired at time1130, and thus after it already un-quiesced its host devices. Computers C1and C2, however, marked SUCCESS, each received the un-quiesce command from the DPA manager before its timeouts expired at time1110and1120, respectively. In such case, a consistent cross tagging was not obtained, because the DPA manager cannot ascertain that there was a single point in time after all three groups G1, G2and G3were tagged but before any of them were un-quiesced; i.e., it cannot ascertain that
max(TE1,TE2,TE3)<min(TB1+Δt1,TB2+Δt2,TB3+Δt3).   (3)
Since the sequence of events ensures that max(TE1, TE2, TE3)<min(TNOTIFY1, TNOTIFY2, TNOTIFY3), the conditions TNOTIFY1<TB1+Δt1, TNOTIFY2<TB2+Δt2and TNOTIFY3<TB3+Δt3suffice to guarantee that Equation (3) holds. These sufficient conditions are the conditions illustrated inFIG. 11.

In reading the above description, persons skilled in the art will realize that there are many apparent variations that can be applied to the methods and systems described. Thus it may be appreciated that the present invention applies to consistent cross tagging across multiple DPA clusters and, more generally, across multiple groups of host devices that write to logical storage units, each group having a mechanism for tagging a state of its logical storage units at specific point in time, and a mechanism for quiescing its host devices.

In the foregoing specification, the invention has been described with reference to specific exemplary embodiments thereof. It will, however, be evident that various modifications and changes may be made to the specific exemplary embodiments without departing from the broader spirit and scope of the invention as set forth in the appended claims. Accordingly, the specification and drawings are to be regarded in an illustrative rather than a restrictive sense.