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425 lines
18 KiB
Plaintext
425 lines
18 KiB
Plaintext
(RDMA: Remote Direct Memory Access)
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RDMA Live Migration Specification, Version # 1
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==============================================
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Wiki: http://wiki.qemu-project.org/Features/RDMALiveMigration
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Github: git@github.com:hinesmr/qemu.git, 'rdma' branch
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Copyright (C) 2013 Michael R. Hines <mrhines@us.ibm.com>
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An *exhaustive* paper (2010) shows additional performance details
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linked on the QEMU wiki above.
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Contents:
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=========
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* Introduction
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* Before running
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* Running
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* Performance
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* RDMA Migration Protocol Description
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* Versioning and Capabilities
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* QEMUFileRDMA Interface
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* Migration of pc.ram
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* Error handling
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* TODO
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Introduction:
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=============
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RDMA helps make your migration more deterministic under heavy load because
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of the significantly lower latency and higher throughput over TCP/IP. This is
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because the RDMA I/O architecture reduces the number of interrupts and
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data copies by bypassing the host networking stack. In particular, a TCP-based
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migration, under certain types of memory-bound workloads, may take a more
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unpredicatable amount of time to complete the migration if the amount of
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memory tracked during each live migration iteration round cannot keep pace
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with the rate of dirty memory produced by the workload.
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RDMA currently comes in two flavors: both Ethernet based (RoCE, or RDMA
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over Converged Ethernet) as well as Infiniband-based. This implementation of
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migration using RDMA is capable of using both technologies because of
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the use of the OpenFabrics OFED software stack that abstracts out the
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programming model irrespective of the underlying hardware.
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Refer to openfabrics.org or your respective RDMA hardware vendor for
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an understanding on how to verify that you have the OFED software stack
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installed in your environment. You should be able to successfully link
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against the "librdmacm" and "libibverbs" libraries and development headers
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for a working build of QEMU to run successfully using RDMA Migration.
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BEFORE RUNNING:
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===============
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Use of RDMA during migration requires pinning and registering memory
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with the hardware. This means that memory must be physically resident
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before the hardware can transmit that memory to another machine.
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If this is not acceptable for your application or product, then the use
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of RDMA migration may in fact be harmful to co-located VMs or other
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software on the machine if there is not sufficient memory available to
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relocate the entire footprint of the virtual machine. If so, then the
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use of RDMA is discouraged and it is recommended to use standard TCP migration.
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Experimental: Next, decide if you want dynamic page registration.
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For example, if you have an 8GB RAM virtual machine, but only 1GB
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is in active use, then enabling this feature will cause all 8GB to
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be pinned and resident in memory. This feature mostly affects the
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bulk-phase round of the migration and can be enabled for extremely
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high-performance RDMA hardware using the following command:
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QEMU Monitor Command:
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$ migrate_set_capability x-rdma-pin-all on # disabled by default
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Performing this action will cause all 8GB to be pinned, so if that's
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not what you want, then please ignore this step altogether.
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On the other hand, this will also significantly speed up the bulk round
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of the migration, which can greatly reduce the "total" time of your migration.
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Example performance of this using an idle VM in the previous example
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can be found in the "Performance" section.
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Note: for very large virtual machines (hundreds of GBs), pinning all
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*all* of the memory of your virtual machine in the kernel is very expensive
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may extend the initial bulk iteration time by many seconds,
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and thus extending the total migration time. However, this will not
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affect the determinism or predictability of your migration you will
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still gain from the benefits of advanced pinning with RDMA.
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RUNNING:
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========
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First, set the migration speed to match your hardware's capabilities:
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QEMU Monitor Command:
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$ migrate_set_speed 40g # or whatever is the MAX of your RDMA device
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Next, on the destination machine, add the following to the QEMU command line:
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qemu ..... -incoming x-rdma:host:port
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Finally, perform the actual migration on the source machine:
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QEMU Monitor Command:
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$ migrate -d x-rdma:host:port
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PERFORMANCE
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===========
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Here is a brief summary of total migration time and downtime using RDMA:
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Using a 40gbps infiniband link performing a worst-case stress test,
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using an 8GB RAM virtual machine:
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Using the following command:
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$ apt-get install stress
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$ stress --vm-bytes 7500M --vm 1 --vm-keep
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1. Migration throughput: 26 gigabits/second.
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2. Downtime (stop time) varies between 15 and 100 milliseconds.
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EFFECTS of memory registration on bulk phase round:
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For example, in the same 8GB RAM example with all 8GB of memory in
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active use and the VM itself is completely idle using the same 40 gbps
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infiniband link:
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1. x-rdma-pin-all disabled total time: approximately 7.5 seconds @ 9.5 Gbps
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2. x-rdma-pin-all enabled total time: approximately 4 seconds @ 26 Gbps
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These numbers would of course scale up to whatever size virtual machine
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you have to migrate using RDMA.
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Enabling this feature does *not* have any measurable affect on
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migration *downtime*. This is because, without this feature, all of the
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memory will have already been registered already in advance during
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the bulk round and does not need to be re-registered during the successive
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iteration rounds.
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RDMA Protocol Description:
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==========================
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Migration with RDMA is separated into two parts:
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1. The transmission of the pages using RDMA
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2. Everything else (a control channel is introduced)
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"Everything else" is transmitted using a formal
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protocol now, consisting of infiniband SEND messages.
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An infiniband SEND message is the standard ibverbs
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message used by applications of infiniband hardware.
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The only difference between a SEND message and an RDMA
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message is that SEND messages cause notifications
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to be posted to the completion queue (CQ) on the
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infiniband receiver side, whereas RDMA messages (used
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for pc.ram) do not (to behave like an actual DMA).
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Messages in infiniband require two things:
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1. registration of the memory that will be transmitted
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2. (SEND only) work requests to be posted on both
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sides of the network before the actual transmission
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can occur.
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RDMA messages are much easier to deal with. Once the memory
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on the receiver side is registered and pinned, we're
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basically done. All that is required is for the sender
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side to start dumping bytes onto the link.
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(Memory is not released from pinning until the migration
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completes, given that RDMA migrations are very fast.)
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SEND messages require more coordination because the
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receiver must have reserved space (using a receive
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work request) on the receive queue (RQ) before QEMUFileRDMA
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can start using them to carry all the bytes as
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a control transport for migration of device state.
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To begin the migration, the initial connection setup is
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as follows (migration-rdma.c):
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1. Receiver and Sender are started (command line or libvirt):
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2. Both sides post two RQ work requests
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3. Receiver does listen()
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4. Sender does connect()
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5. Receiver accept()
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6. Check versioning and capabilities (described later)
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At this point, we define a control channel on top of SEND messages
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which is described by a formal protocol. Each SEND message has a
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header portion and a data portion (but together are transmitted
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as a single SEND message).
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Header:
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* Length (of the data portion, uint32, network byte order)
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* Type (what command to perform, uint32, network byte order)
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* Repeat (Number of commands in data portion, same type only)
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The 'Repeat' field is here to support future multiple page registrations
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in a single message without any need to change the protocol itself
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so that the protocol is compatible against multiple versions of QEMU.
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Version #1 requires that all server implementations of the protocol must
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check this field and register all requests found in the array of commands located
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in the data portion and return an equal number of results in the response.
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The maximum number of repeats is hard-coded to 4096. This is a conservative
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limit based on the maximum size of a SEND message along with empirical
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observations on the maximum future benefit of simultaneous page registrations.
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The 'type' field has 12 different command values:
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1. Unused
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2. Error (sent to the source during bad things)
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3. Ready (control-channel is available)
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4. QEMU File (for sending non-live device state)
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5. RAM Blocks request (used right after connection setup)
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6. RAM Blocks result (used right after connection setup)
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7. Compress page (zap zero page and skip registration)
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8. Register request (dynamic chunk registration)
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9. Register result ('rkey' to be used by sender)
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10. Register finished (registration for current iteration finished)
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11. Unregister request (unpin previously registered memory)
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12. Unregister finished (confirmation that unpin completed)
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A single control message, as hinted above, can contain within the data
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portion an array of many commands of the same type. If there is more than
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one command, then the 'repeat' field will be greater than 1.
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After connection setup, message 5 & 6 are used to exchange ram block
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information and optionally pin all the memory if requested by the user.
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After ram block exchange is completed, we have two protocol-level
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functions, responsible for communicating control-channel commands
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using the above list of values:
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Logically:
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qemu_rdma_exchange_recv(header, expected command type)
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1. We transmit a READY command to let the sender know that
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we are *ready* to receive some data bytes on the control channel.
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2. Before attempting to receive the expected command, we post another
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RQ work request to replace the one we just used up.
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3. Block on a CQ event channel and wait for the SEND to arrive.
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4. When the send arrives, librdmacm will unblock us.
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5. Verify that the command-type and version received matches the one we expected.
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qemu_rdma_exchange_send(header, data, optional response header & data):
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1. Block on the CQ event channel waiting for a READY command
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from the receiver to tell us that the receiver
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is *ready* for us to transmit some new bytes.
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2. Optionally: if we are expecting a response from the command
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(that we have not yet transmitted), let's post an RQ
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work request to receive that data a few moments later.
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3. When the READY arrives, librdmacm will
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unblock us and we immediately post a RQ work request
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to replace the one we just used up.
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4. Now, we can actually post the work request to SEND
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the requested command type of the header we were asked for.
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5. Optionally, if we are expecting a response (as before),
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we block again and wait for that response using the additional
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work request we previously posted. (This is used to carry
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'Register result' commands #6 back to the sender which
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hold the rkey need to perform RDMA. Note that the virtual address
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corresponding to this rkey was already exchanged at the beginning
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of the connection (described below).
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All of the remaining command types (not including 'ready')
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described above all use the aformentioned two functions to do the hard work:
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1. After connection setup, RAMBlock information is exchanged using
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this protocol before the actual migration begins. This information includes
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a description of each RAMBlock on the server side as well as the virtual addresses
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and lengths of each RAMBlock. This is used by the client to determine the
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start and stop locations of chunks and how to register them dynamically
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before performing the RDMA operations.
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2. During runtime, once a 'chunk' becomes full of pages ready to
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be sent with RDMA, the registration commands are used to ask the
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other side to register the memory for this chunk and respond
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with the result (rkey) of the registration.
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3. Also, the QEMUFile interfaces also call these functions (described below)
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when transmitting non-live state, such as devices or to send
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its own protocol information during the migration process.
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4. Finally, zero pages are only checked if a page has not yet been registered
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using chunk registration (or not checked at all and unconditionally
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written if chunk registration is disabled. This is accomplished using
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the "Compress" command listed above. If the page *has* been registered
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then we check the entire chunk for zero. Only if the entire chunk is
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zero, then we send a compress command to zap the page on the other side.
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Versioning and Capabilities
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===========================
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Current version of the protocol is version #1.
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The same version applies to both for protocol traffic and capabilities
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negotiation. (i.e. There is only one version number that is referred to
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by all communication).
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librdmacm provides the user with a 'private data' area to be exchanged
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at connection-setup time before any infiniband traffic is generated.
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Header:
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* Version (protocol version validated before send/recv occurs),
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uint32, network byte order
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* Flags (bitwise OR of each capability),
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uint32, network byte order
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There is no data portion of this header right now, so there is
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no length field. The maximum size of the 'private data' section
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is only 192 bytes per the Infiniband specification, so it's not
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very useful for data anyway. This structure needs to remain small.
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This private data area is a convenient place to check for protocol
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versioning because the user does not need to register memory to
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transmit a few bytes of version information.
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This is also a convenient place to negotiate capabilities
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(like dynamic page registration).
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If the version is invalid, we throw an error.
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If the version is new, we only negotiate the capabilities that the
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requested version is able to perform and ignore the rest.
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Currently there is only one capability in Version #1: dynamic page registration
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Finally: Negotiation happens with the Flags field: If the primary-VM
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sets a flag, but the destination does not support this capability, it
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will return a zero-bit for that flag and the primary-VM will understand
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that as not being an available capability and will thus disable that
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capability on the primary-VM side.
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QEMUFileRDMA Interface:
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=======================
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QEMUFileRDMA introduces a couple of new functions:
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1. qemu_rdma_get_buffer() (QEMUFileOps rdma_read_ops)
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2. qemu_rdma_put_buffer() (QEMUFileOps rdma_write_ops)
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These two functions are very short and simply use the protocol
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describe above to deliver bytes without changing the upper-level
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users of QEMUFile that depend on a bytestream abstraction.
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Finally, how do we handoff the actual bytes to get_buffer()?
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Again, because we're trying to "fake" a bytestream abstraction
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using an analogy not unlike individual UDP frames, we have
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to hold on to the bytes received from control-channel's SEND
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messages in memory.
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Each time we receive a complete "QEMU File" control-channel
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message, the bytes from SEND are copied into a small local holding area.
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Then, we return the number of bytes requested by get_buffer()
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and leave the remaining bytes in the holding area until get_buffer()
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comes around for another pass.
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If the buffer is empty, then we follow the same steps
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listed above and issue another "QEMU File" protocol command,
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asking for a new SEND message to re-fill the buffer.
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Migration of pc.ram:
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====================
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At the beginning of the migration, (migration-rdma.c),
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the sender and the receiver populate the list of RAMBlocks
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to be registered with each other into a structure.
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Then, using the aforementioned protocol, they exchange a
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description of these blocks with each other, to be used later
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during the iteration of main memory. This description includes
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a list of all the RAMBlocks, their offsets and lengths, virtual
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addresses and possibly includes pre-registered RDMA keys in case dynamic
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page registration was disabled on the server-side, otherwise not.
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Main memory is not migrated with the aforementioned protocol,
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but is instead migrated with normal RDMA Write operations.
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Pages are migrated in "chunks" (hard-coded to 1 Megabyte right now).
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Chunk size is not dynamic, but it could be in a future implementation.
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There's nothing to indicate that this is useful right now.
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When a chunk is full (or a flush() occurs), the memory backed by
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the chunk is registered with librdmacm is pinned in memory on
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both sides using the aforementioned protocol.
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After pinning, an RDMA Write is generated and transmitted
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for the entire chunk.
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Chunks are also transmitted in batches: This means that we
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do not request that the hardware signal the completion queue
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for the completion of *every* chunk. The current batch size
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is about 64 chunks (corresponding to 64 MB of memory).
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Only the last chunk in a batch must be signaled.
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This helps keep everything as asynchronous as possible
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and helps keep the hardware busy performing RDMA operations.
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Error-handling:
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===============
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Infiniband has what is called a "Reliable, Connected"
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link (one of 4 choices). This is the mode in which
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we use for RDMA migration.
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If a *single* message fails,
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the decision is to abort the migration entirely and
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cleanup all the RDMA descriptors and unregister all
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the memory.
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After cleanup, the Virtual Machine is returned to normal
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operation the same way that would happen if the TCP
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socket is broken during a non-RDMA based migration.
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TODO:
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=====
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1. 'migrate x-rdma:host:port' and '-incoming x-rdma' options will be
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renamed to 'rdma' after the experimental phase of this work has
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completed upstream.
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2. Currently, 'ulimit -l' mlock() limits as well as cgroups swap limits
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are not compatible with infinband memory pinning and will result in
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an aborted migration (but with the source VM left unaffected).
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3. Use of the recent /proc/<pid>/pagemap would likely speed up
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the use of KSM and ballooning while using RDMA.
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4. Also, some form of balloon-device usage tracking would also
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help alleviate some issues.
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5. Move UNREGISTER requests to a separate thread.
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6. Use LRU to provide more fine-grained direction of UNREGISTER
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requests for unpinning memory in an overcommitted environment.
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7. Expose UNREGISTER support to the user by way of workload-specific
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hints about application behavior.
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