qemu/docs/rdma.txt

(RDMA: Remote Direct Memory Access)
RDMA Live Migration Specification, Version # 1
==============================================
Wiki: http://wiki.qemu.org/Features/RDMALiveMigration
Github: git@github.com:hinesmr/qemu.git, 'rdma' branch

Copyright (C) 2013 Michael R. Hines <mrhines@us.ibm.com>

An *exhaustive* paper (2010) shows additional performance details
linked on the QEMU wiki above.

Contents:
=========
* Introduction
* Before running
* Running
* Performance
* RDMA Migration Protocol Description
* Versioning and Capabilities
* QEMUFileRDMA Interface
* Migration of pc.ram
* Error handling
* TODO

Introduction:
=============

RDMA helps make your migration more deterministic under heavy load because
of the significantly lower latency and higher throughput over TCP/IP. This is
because the RDMA I/O architecture reduces the number of interrupts and
data copies by bypassing the host networking stack. In particular, a TCP-based
migration, under certain types of memory-bound workloads, may take a more
unpredicatable amount of time to complete the migration if the amount of
memory tracked during each live migration iteration round cannot keep pace
with the rate of dirty memory produced by the workload.

RDMA currently comes in two flavors: both Ethernet based (RoCE, or RDMA
over Converged Ethernet) as well as Infiniband-based. This implementation of
migration using RDMA is capable of using both technologies because of
the use of the OpenFabrics OFED software stack that abstracts out the
programming model irrespective of the underlying hardware.

Refer to openfabrics.org or your respective RDMA hardware vendor for
an understanding on how to verify that you have the OFED software stack
installed in your environment. You should be able to successfully link
against the "librdmacm" and "libibverbs" libraries and development headers
for a working build of QEMU to run successfully using RDMA Migration.

BEFORE RUNNING:
===============

Use of RDMA during migration requires pinning and registering memory
with the hardware. This means that memory must be physically resident
before the hardware can transmit that memory to another machine.
If this is not acceptable for your application or product, then the use
of RDMA migration may in fact be harmful to co-located VMs or other
software on the machine if there is not sufficient memory available to
relocate the entire footprint of the virtual machine. If so, then the
use of RDMA is discouraged and it is recommended to use standard TCP migration.

Experimental: Next, decide if you want dynamic page registration.
For example, if you have an 8GB RAM virtual machine, but only 1GB
is in active use, then enabling this feature will cause all 8GB to
be pinned and resident in memory. This feature mostly affects the
bulk-phase round of the migration and can be enabled for extremely
high-performance RDMA hardware using the following command:

QEMU Monitor Command:
$ migrate_set_capability x-rdma-pin-all on # disabled by default

Performing this action will cause all 8GB to be pinned, so if that's
not what you want, then please ignore this step altogether.

On the other hand, this will also significantly speed up the bulk round
of the migration, which can greatly reduce the "total" time of your migration.
Example performance of this using an idle VM in the previous example
can be found in the "Performance" section.

Note: for very large virtual machines (hundreds of GBs), pinning all
*all* of the memory of your virtual machine in the kernel is very expensive
may extend the initial bulk iteration time by many seconds,
and thus extending the total migration time. However, this will not
affect the determinism or predictability of your migration you will
still gain from the benefits of advanced pinning with RDMA.

RUNNING:
========

First, set the migration speed to match your hardware's capabilities:

QEMU Monitor Command:
$ migrate_set_speed 40g # or whatever is the MAX of your RDMA device

Next, on the destination machine, add the following to the QEMU command line:

qemu ..... -incoming x-rdma:host:port

Finally, perform the actual migration on the source machine:

QEMU Monitor Command:
$ migrate -d x-rdma:host:port

PERFORMANCE
===========

Here is a brief summary of total migration time and downtime using RDMA:
Using a 40gbps infiniband link performing a worst-case stress test,
using an 8GB RAM virtual machine:

Using the following command:
$ apt-get install stress
$ stress --vm-bytes 7500M --vm 1 --vm-keep

1. Migration throughput: 26 gigabits/second.
2. Downtime (stop time) varies between 15 and 100 milliseconds.

EFFECTS of memory registration on bulk phase round:

For example, in the same 8GB RAM example with all 8GB of memory in
active use and the VM itself is completely idle using the same 40 gbps
infiniband link:

1. x-rdma-pin-all disabled total time: approximately 7.5 seconds @ 9.5 Gbps
2. x-rdma-pin-all enabled total time: approximately 4 seconds @ 26 Gbps

These numbers would of course scale up to whatever size virtual machine
you have to migrate using RDMA.

Enabling this feature does *not* have any measurable affect on
migration *downtime*. This is because, without this feature, all of the
memory will have already been registered already in advance during
the bulk round and does not need to be re-registered during the successive
iteration rounds.

RDMA Protocol Description:
==========================

Migration with RDMA is separated into two parts:

1. The transmission of the pages using RDMA
2. Everything else (a control channel is introduced)

"Everything else" is transmitted using a formal
protocol now, consisting of infiniband SEND messages.

An infiniband SEND message is the standard ibverbs
message used by applications of infiniband hardware.
The only difference between a SEND message and an RDMA
message is that SEND messages cause notifications
to be posted to the completion queue (CQ) on the
infiniband receiver side, whereas RDMA messages (used
for pc.ram) do not (to behave like an actual DMA).

Messages in infiniband require two things:

1. registration of the memory that will be transmitted
2. (SEND only) work requests to be posted on both
   sides of the network before the actual transmission
   can occur.

RDMA messages are much easier to deal with. Once the memory
on the receiver side is registered and pinned, we're
basically done. All that is required is for the sender
side to start dumping bytes onto the link.

(Memory is not released from pinning until the migration
completes, given that RDMA migrations are very fast.)

SEND messages require more coordination because the
receiver must have reserved space (using a receive
work request) on the receive queue (RQ) before QEMUFileRDMA
can start using them to carry all the bytes as
a control transport for migration of device state.

To begin the migration, the initial connection setup is
as follows (migration-rdma.c):

1. Receiver and Sender are started (command line or libvirt):
2. Both sides post two RQ work requests
3. Receiver does listen()
4. Sender does connect()
5. Receiver accept()
6. Check versioning and capabilities (described later)

At this point, we define a control channel on top of SEND messages
which is described by a formal protocol. Each SEND message has a
header portion and a data portion (but together are transmitted
as a single SEND message).

Header:
    * Length               (of the data portion, uint32, network byte order)
    * Type                 (what command to perform, uint32, network byte order)
    * Repeat               (Number of commands in data portion, same type only)

The 'Repeat' field is here to support future multiple page registrations
in a single message without any need to change the protocol itself
so that the protocol is compatible against multiple versions of QEMU.
Version #1 requires that all server implementations of the protocol must
check this field and register all requests found in the array of commands located
in the data portion and return an equal number of results in the response.
The maximum number of repeats is hard-coded to 4096. This is a conservative
limit based on the maximum size of a SEND message along with emperical
observations on the maximum future benefit of simultaneous page registrations.

The 'type' field has 12 different command values:
     1. Unused
     2. Error                      (sent to the source during bad things)
     3. Ready                      (control-channel is available)
     4. QEMU File                  (for sending non-live device state)
     5. RAM Blocks request         (used right after connection setup)
     6. RAM Blocks result          (used right after connection setup)
     7. Compress page              (zap zero page and skip registration)
     8. Register request           (dynamic chunk registration)
     9. Register result            ('rkey' to be used by sender)
    10. Register finished          (registration for current iteration finished)
    11. Unregister request         (unpin previously registered memory)
    12. Unregister finished        (confirmation that unpin completed)

A single control message, as hinted above, can contain within the data
portion an array of many commands of the same type. If there is more than
one command, then the 'repeat' field will be greater than 1.

After connection setup, message 5 & 6 are used to exchange ram block
information and optionally pin all the memory if requested by the user.

After ram block exchange is completed, we have two protocol-level
functions, responsible for communicating control-channel commands
using the above list of values:

Logically:

qemu_rdma_exchange_recv(header, expected command type)

1. We transmit a READY command to let the sender know that
   we are *ready* to receive some data bytes on the control channel.
2. Before attempting to receive the expected command, we post another
   RQ work request to replace the one we just used up.
3. Block on a CQ event channel and wait for the SEND to arrive.
4. When the send arrives, librdmacm will unblock us.
5. Verify that the command-type and version received matches the one we expected.

qemu_rdma_exchange_send(header, data, optional response header & data):

1. Block on the CQ event channel waiting for a READY command
   from the receiver to tell us that the receiver
   is *ready* for us to transmit some new bytes.
2. Optionally: if we are expecting a response from the command
   (that we have not yet transmitted), let's post an RQ
   work request to receive that data a few moments later.
3. When the READY arrives, librdmacm will
   unblock us and we immediately post a RQ work request
   to replace the one we just used up.
4. Now, we can actually post the work request to SEND
   the requested command type of the header we were asked for.
5. Optionally, if we are expecting a response (as before),
   we block again and wait for that response using the additional
   work request we previously posted. (This is used to carry
   'Register result' commands #6 back to the sender which
   hold the rkey need to perform RDMA. Note that the virtual address
   corresponding to this rkey was already exchanged at the beginning
   of the connection (described below).

All of the remaining command types (not including 'ready')
described above all use the aformentioned two functions to do the hard work:

1. After connection setup, RAMBlock information is exchanged using
   this protocol before the actual migration begins. This information includes
   a description of each RAMBlock on the server side as well as the virtual addresses
   and lengths of each RAMBlock. This is used by the client to determine the
   start and stop locations of chunks and how to register them dynamically
   before performing the RDMA operations.
2. During runtime, once a 'chunk' becomes full of pages ready to
   be sent with RDMA, the registration commands are used to ask the
   other side to register the memory for this chunk and respond
   with the result (rkey) of the registration.
3. Also, the QEMUFile interfaces also call these functions (described below)
   when transmitting non-live state, such as devices or to send
   its own protocol information during the migration process.
4. Finally, zero pages are only checked if a page has not yet been registered
   using chunk registration (or not checked at all and unconditionally
   written if chunk registration is disabled. This is accomplished using
   the "Compress" command listed above. If the page *has* been registered
   then we check the entire chunk for zero. Only if the entire chunk is
   zero, then we send a compress command to zap the page on the other side.

Versioning and Capabilities
===========================
Current version of the protocol is version #1.

The same version applies to both for protocol traffic and capabilities
negotiation. (i.e. There is only one version number that is referred to
by all communication).

librdmacm provides the user with a 'private data' area to be exchanged
at connection-setup time before any infiniband traffic is generated.

Header:
    * Version (protocol version validated before send/recv occurs),
                                               uint32, network byte order
    * Flags   (bitwise OR of each capability),
                                               uint32, network byte order

There is no data portion of this header right now, so there is
no length field. The maximum size of the 'private data' section
is only 192 bytes per the Infiniband specification, so it's not
very useful for data anyway. This structure needs to remain small.

This private data area is a convenient place to check for protocol
versioning because the user does not need to register memory to
transmit a few bytes of version information.

This is also a convenient place to negotiate capabilities
(like dynamic page registration).

If the version is invalid, we throw an error.

If the version is new, we only negotiate the capabilities that the
requested version is able to perform and ignore the rest.

Currently there is only one capability in Version #1: dynamic page registration

Finally: Negotiation happens with the Flags field: If the primary-VM
sets a flag, but the destination does not support this capability, it
will return a zero-bit for that flag and the primary-VM will understand
that as not being an available capability and will thus disable that
capability on the primary-VM side.

QEMUFileRDMA Interface:
=======================

QEMUFileRDMA introduces a couple of new functions:

1. qemu_rdma_get_buffer()               (QEMUFileOps rdma_read_ops)
2. qemu_rdma_put_buffer()               (QEMUFileOps rdma_write_ops)

These two functions are very short and simply use the protocol
describe above to deliver bytes without changing the upper-level
users of QEMUFile that depend on a bytestream abstraction.

Finally, how do we handoff the actual bytes to get_buffer()?

Again, because we're trying to "fake" a bytestream abstraction
using an analogy not unlike individual UDP frames, we have
to hold on to the bytes received from control-channel's SEND
messages in memory.

Each time we receive a complete "QEMU File" control-channel
message, the bytes from SEND are copied into a small local holding area.

Then, we return the number of bytes requested by get_buffer()
and leave the remaining bytes in the holding area until get_buffer()
comes around for another pass.

If the buffer is empty, then we follow the same steps
listed above and issue another "QEMU File" protocol command,
asking for a new SEND message to re-fill the buffer.

Migration of pc.ram:
====================

At the beginning of the migration, (migration-rdma.c),
the sender and the receiver populate the list of RAMBlocks
to be registered with each other into a structure.
Then, using the aforementioned protocol, they exchange a
description of these blocks with each other, to be used later
during the iteration of main memory. This description includes
a list of all the RAMBlocks, their offsets and lengths, virtual
addresses and possibly includes pre-registered RDMA keys in case dynamic
page registration was disabled on the server-side, otherwise not.

Main memory is not migrated with the aforementioned protocol,
but is instead migrated with normal RDMA Write operations.

Pages are migrated in "chunks" (hard-coded to 1 Megabyte right now).
Chunk size is not dynamic, but it could be in a future implementation.
There's nothing to indicate that this is useful right now.

When a chunk is full (or a flush() occurs), the memory backed by
the chunk is registered with librdmacm is pinned in memory on
both sides using the aforementioned protocol.
After pinning, an RDMA Write is generated and transmitted
for the entire chunk.

Chunks are also transmitted in batches: This means that we
do not request that the hardware signal the completion queue
for the completion of *every* chunk. The current batch size
is about 64 chunks (corresponding to 64 MB of memory).
Only the last chunk in a batch must be signaled.
This helps keep everything as asynchronous as possible
and helps keep the hardware busy performing RDMA operations.

Error-handling:
===============

Infiniband has what is called a "Reliable, Connected"
link (one of 4 choices). This is the mode in which
we use for RDMA migration.

If a *single* message fails,
the decision is to abort the migration entirely and
cleanup all the RDMA descriptors and unregister all
the memory.

After cleanup, the Virtual Machine is returned to normal
operation the same way that would happen if the TCP
socket is broken during a non-RDMA based migration.

TODO:
=====
1. 'migrate x-rdma:host:port' and '-incoming x-rdma' options will be
   renamed to 'rdma' after the experimental phase of this work has
   completed upstream.
2. Currently, 'ulimit -l' mlock() limits as well as cgroups swap limits
   are not compatible with infinband memory pinning and will result in
   an aborted migration (but with the source VM left unaffected).
3. Use of the recent /proc/<pid>/pagemap would likely speed up
   the use of KSM and ballooning while using RDMA.
4. Also, some form of balloon-device usage tracking would also
   help alleviate some issues.
5. Move UNREGISTER requests to a separate thread.
6. Use LRU to provide more fine-grained direction of UNREGISTER
   requests for unpinning memory in an overcommitted environment.
7. Expose UNREGISTER support to the user by way of workload-specific
   hints about application behavior.