Berkeley DB Reference Guide: Transactional guarantees
Description: Berkeley DB: An embedded database programmatic toolkit.
Keywords: embedded,database,programmatic,toolkit,btree,hash,hashing,transaction,transactions,locking,logging,access method,access methods,Java,C,C++

### Berkeley DB Reference Guide: Berkeley DB Replication |

### Transactional guarantees

It is important to consider replication in the context of the overall database environment's transactional guarantees. To briefly review, transactional guarantees in a non-replicated application are based on the writing of log file records to "stable storage", usually a disk drive. If the application or system then fails, the Berkeley DB logging information is reviewed during recovery, and the databases are updated so that all changes made as part of committed transactions appear, and all changes made as part of uncommitted transactions do not appear. In this case, no information will have been lost.

If a database environment does not require the log be flushed to stable storage on transaction commit (using the DB_TXN_NOSYNC flag to increase performance at the cost of sacrificing transactional durability), Berkeley DB recovery will only be able to restore the system to the state of the last commit found on stable storage. In this case, information may have been lost (for example, the changes made by some committed transactions may not appear in the databases after recovery).

Further, if there is database or log file loss or corruption (for example, if a disk drive fails), then catastrophic recovery is necessary, and Berkeley DB recovery will only be able to restore the system to the state of the last archived log file. In this case, information may also have been lost.

Replicating the database environment extends this model, by adding a new component to "stable storage": the client's replicated information. If a database environment is replicated, there is no lost information in the case of database or log file loss, because the replicated system can be configured to contain a complete set of databases and log records up to the point of failure. A database environment that loses a disk drive can have the drive replaced, and it can then rejoin the replication group.

Because of this new component of stable storage, specifying DB_TXN_NOSYNC in a replicated environment no longer sacrifices durability, as long as one or more clients have acknowledged receipt of the messages sent by the master. Since network connections are often faster than local synchronous disk writes, replication becomes a way for applications to significantly improve their performance as well as their reliability.

The return status from the application's send function must be set by the application to ensure the transactional guarantees the application wants to provide. Whenever the send function returns failure, the local database environment's log is flushed as necessary to ensure that any information critical to database integrity is not lost. Because this flush is an expensive operation in terms of database performance, applications should avoid returning an error from the send function, if at all possible.

The only interesting message type for replication transactional guarantees is when the application's send function was called with the DB_REP_PERMANENT flag specified. There is no reason for the send function to ever return failure unless the DB_REP_PERMANENT flag was specified -- messages without the DB_REP_PERMANENT flag do not make visible changes to databases, and the send function can return success to Berkeley DB as soon as the message has been sent to the client(s) or even just copied to local application memory in preparation for being sent.

When a client receives a DB_REP_PERMANENT message, the client will flush its log to stable storage before returning (unless the client environment has been configured with the DB_TXN_NOSYNC option). If the client is unable to flush a complete transactional record to disk for any reason (for example, there is a missing log record before the flagged message), the call to the DB_ENV->rep_process_message method on the client will return DB_REP_NOTPERM and return the LSN of this record to the application in the ret_lsnp parameter. The application's client or master message handling loops should take proper action to ensure the correct transactional guarantees in this case. When missing records arrive and allow subsequent processing of previously stored permanent records, the call to the DB_ENV->rep_process_message method on the client will return DB_REP_ISPERM and return the largest LSN of the permanent records that were flushed to disk. Client applications can use these LSNs to know definitively if any particular LSN is permanently stored or not.

An application relying on a client's ability to become a master and guarantee that no data has been lost will need to write the send function to return an error whenever it cannot guarantee the site that will win the next election has the record. Applications not requiring this level of transactional guarantees need not have the send function return failure (unless the master's database environment has been configured with DB_TXN_NOSYNC), as any information critical to database integrity has already been flushed to the local log before send was called.

To sum up, the only reason for the send function to return failure is when the master database environment has been configured to not synchronously flush the log on transaction commit (that is, DB_TXN_NOSYNC was configured on the master), the DB_REP_PERMANENT flag is specified for the message, and the send function was unable to determine that some number of clients have received the current message (and all messages preceding the current message). How many clients need to receive the message before the send function can return success is an application choice (and may not depend as much on a specific number of clients reporting success as one or more geographically distributed clients).

If, however, the application does require on-disk durability on the master, the master should be configured to synchronously flush the log on commit. If clients are not configured to synchronously flush the log, that is, if a client is running with DB_TXN_NOSYNC configured, then it is up to the application to reconfigure that client appropriately when it becomes a master. That is, the application must explicitly call DB_ENV->set_flags to disable asynchronous log flushing as part of re-configuring the client as the new master.

Of course, it is important to ensure that the replicated master and client environments are truly independent of each other. For example, it does not help matters that a client has acknowledged receipt of a message if both master and clients are on the same power supply, as the failure of the power supply will still potentially lose information.

Configuring your replication-based application to achieve the proper mix of performance and transactional guarantees can be complex. In brief, there are a few controls an application can set to configure the guarantees it makes: specification of DB_TXN_NOSYNC for the master environment, specification of DB_TXN_NOSYNC for the client environment, the priorities of different sites participating in an election, and the behavior of the application's send function.

Applications using Replication Manager are free to use DB_TXN_NOSYNC at the master and/or clients as they see fit. The behavior of the send function that Replication Manager provides on the application's behalf is determined by an "acknowledgement policy", which is configured by the DB_ENV->repmgr_set_ack_policy method. Clients always send acknowledgements for DB_REP_PERMANENT messages (unless the acknowledgement policy in effect indicates that the master doesn't care about them). For a DB_REP_PERMANENT message, the master blocks the sending thread until either it receives the proper number of acknowledgements, or the DB_REP_ACK_TIMEOUT expires. In the case of timeout, Replication Manager returns an error code from the send function, causing Berkeley DB to flush the transaction log before returning to the application, as previously described. The default acknowledgement policy is DB_REPMGR_ACKS_QUORUM, which ensures that the effect of a permanent record remains durable following an election.

First, it is rarely useful to write and synchronously flush the log when a transaction commits on a replication client. It may be useful where systems share resources and multiple systems commonly fail at the same time. By default, all Berkeley DB database environments, whether master or client, synchronously flush the log on transaction commit or prepare. Generally, replication masters and clients turn log flush off for transaction commit using the DB_TXN_NOSYNC flag.

Consider two systems connected by a network interface. One acts as the master, the other as a read-only client. The client takes over as master if the master crashes and the master rejoins the replication group after such a failure. Both master and client are configured to not synchronously flush the log on transaction commit (that is, DB_TXN_NOSYNC was configured on both systems). The application's send function never returns failure to the Berkeley DB library, simply forwarding messages to the client (perhaps over a broadcast mechanism), and always returning success. On the client, any DB_REP_NOTPERM returns from the client's DB_ENV->rep_process_message method are ignored, as well. This system configuration has excellent performance, but may lose data in some failure modes.

If both the master and the client crash at once, it is possible to lose committed transactions, that is, transactional durability is not being maintained. Reliability can be increased by providing separate power supplies for the systems and placing them in separate physical locations.

If the connection between the two machines fails (or just some number of messages are lost), and subsequently the master crashes, it is possible to lose committed transactions. Again, because transactional durability is not being maintained. Reliability can be improved in a couple of ways:

1. Use a reliable network protocol (for example, TCP/IP instead of UDP).

2. Increase the number of clients and network paths to make it less likely that a message will be lost. In this case, it is important to also make sure a client that did receive the message wins any subsequent election. If a client that did not receive the message wins a subsequent election, data can still be lost.

Further, systems may want to guarantee message delivery to the client(s) (for example, to prevent a network connection from simply discarding messages). Some systems may want to ensure clients never return out-of-date information, that is, once a transaction commit returns success on the master, no client will return old information to a read-only query. Some of the following changes may be used to address these issues:

1. Write the application's send function to not return to Berkeley DB until one or more clients have acknowledged receipt of the message. The number of clients chosen will be dependent on the application: you will want to consider likely network partitions (ensure that a client at each physical site receives the message) and geographical diversity (ensure that a client on each coast receives the message).

2. Write the client's message processing loop to not acknowledge receipt of the message until a call to the DB_ENV->rep_process_message method has returned success. Messages resulting in a return of DB_REP_NOTPERM from the DB_ENV->rep_process_message method mean the message could not be flushed to the client's disk. If the client does not acknowledge receipt of such messages to the master until a subsequent call to the DB_ENV->rep_process_message method returns DB_REP_ISPERM and the LSN returned is at least as large as this message's LSN, then the master's send function will not return success to the Berkeley DB library. This means the thread committing the transaction on the master will not be allowed to proceed based on the transaction having committed until the selected set of clients have received the message and consider it complete.

   Alternatively, the client's message processing loop could acknowledge the message to the master, but with an error code indicating that the application's send function should not return to the Berkeley DB library until a subsequent acknowledgement from the same client indicates success.

   The application send callback function invoked by Berkeley DB contains an LSN of the record being sent (if appropriate for that record). When DB_ENV->rep_process_message method returns indicators that a permanent record has been written then it also returns the maximum LSN of the permanent record written.

There is one final pair of failure scenarios to consider. First, it is not possible to abort transactions after the application's send function has been called, as the master may have already written the commit log records to disk, and so abort is no longer an option. Second, a related problem is that even though the master will attempt to flush the local log if the send function returns failure, that flush may fail (for example, when the local disk is full). Again, the transaction cannot be aborted as one or more clients may have committed the transaction even if send returns failure. Rare applications may not be able to tolerate these unlikely failure modes. In that case the application may want to:

1. Configure the master to do always local synchronous commits (turning off the DB_TXN_NOSYNC configuration). This will decrease performance significantly, of course (one of the reasons to use replication is to avoid local disk writes.) In this configuration, failure to write the local log will cause the transaction to abort in all cases.

2. Do not return from the application's send function under any conditions, until the selected set of clients has acknowledged the message. Until the send function returns to the Berkeley DB library, the thread committing the transaction on the master will wait, and so no application will be able to act on the knowledge that the transaction has committed.

The final alternative for applications concerned about these types of failure is to use distributed transactions as an alternative means of replication, guaranteeing full consistency at the cost of implementing a Global Transaction Manager and performing two-phase commit across multiple Berkeley DB database environments. More information on this topic can be found in the Distributed Transactions chapter.

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