- 15 Oct, 2017 5 commits
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Vivien Didelot authored
The .set_addr function does nothing, remove the dsa_loop implementation before getting rid of it completely in DSA. Signed-off-by:
Vivien Didelot <vivien.didelot@savoirfairelinux.com> Signed-off-by:
David S. Miller <davem@davemloft.net>
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Vivien Didelot authored
As for mv88e6xxx, setup the switch from within the mv88e6060 driver with a random MAC address, and remove the .set_addr implementation. Signed-off-by:
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Vivien Didelot authored
The 88E6060 Ethernet switch always transmits the multicast bit of the switch MAC address as a zero. It re-uses the corresponding bit 8 of the register "Switch MAC Address Register Bytes 0 & 1" for "DiffAddr". If the "DiffAddr" bit is 0, then all ports transmit the same source address. If it is set to 1, then bit 2:0 are used for the port number. The mv88e6060 driver is currently wrongly shifting the MAC address byte 0 by 9. To fix this, shift it by 8 as usual and clear its bit 0. Signed-off-by:
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Vivien Didelot authored
An Ethernet switch may support having a MAC address, which can be used as the switch's source address in transmitted full-duplex Pause frames. If a DSA switch supports the related .set_addr operation, the DSA core sets the master's MAC address on the switch. This won't make sense anymore in a multi-CPU ports system, because there won't be a unique master device assigned to a switch tree. Instead, setup the switch from within the Marvell driver with a random MAC address, and remove the .set_addr implementation. Signed-off-by:
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Gustavo A. R. Silva authored
In preparation to enabling -Wimplicit-fallthrough, mark switch cases where we are expecting to fall through. Signed-off-by:
Gustavo A. R. Silva <garsilva@embeddedor.com> Signed-off-by:
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- 14 Oct, 2017 17 commits
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David S. Miller authored
Jakub Kicinski says: ==================== nfp: bpf: support direct packet access The core of this series is direct packet access support. With a small change to the verifier, the offloaded code can now make use of DPA. We need to be careful to use kernel (after initial translation) offsets in our JIT. Direct packet access also brings us to the problem of eBPF endianness. After considering the changes necessary we decided to not support translation on both BE and LE hosts, for now. This series contains two fixes - one for compare instructions and one for ineffective jne optimization. I chose to include fixes in this set because the code in -net works only with unreleased PoC FW (ABI version 1) and therefore nobody outside of Netronome can exercise it anyway. ==================== Signed-off-by: -
Jakub Kicinski authored
Add support for direct packet access in TC, note that because writing the packet will cause the verifier to generate a csum fixup prologue we won't be able to offload packet writes from TC, just yet, only the reads will work. Signed-off-by:
Jakub Kicinski <jakub.kicinski@netronome.com> Reviewed-by:
Simon Horman <simon.horman@netronome.com> Signed-off-by:
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Jakub Kicinski authored
This patch adds ability to write packet contents using pre-validated packet pointers (direct packet access). Signed-off-by:
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Jakub Kicinski authored
In direct packet access bound checks are already done, we can simply dereference the packet pointer. Verifier/parser logic needs to record pointer type. Note that although verifier does protect us from CTX vs other pointer changes we will also want to differentiate between PACKET vs MAP_VALUE or STACK, so we can add the check already. Signed-off-by:
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Jakub Kicinski authored
Move data load into a separate function and separate it from packet length checks of legacy I/O. This makes the code more readable and easier to reuse. Signed-off-by:
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Jakub Kicinski authored
Sizes of fields in struct xdp_md/xdp_buff and some in sk_buff depend on target architecture. Take that into account and use struct xdp_buff, not struct xdp_md. Signed-off-by:
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Jakub Kicinski authored
eBPF is host-endian specific. Translating both BE and LE eBPF to the NFP is feasible, but would require quite a bit of indirection. The fact that I don't have access to any BE hosts that would fit a 25G/40G/100G NIC is also limiting my ability to test big endian. For now restrict the offload to little endian hosts only. Signed-off-by:
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Jakub Kicinski authored
Implement byte swaps with rotations, shifts and byte loads. Remember to clear upper parts of the 64 bit registers. Signed-off-by:
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Jakub Kicinski authored
Register move operation is encoded as alu no op. This means that one has to specify number of unused/none parameters to the emit_alu(). Add a helper. Signed-off-by:
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Jakub Kicinski authored
Now that we have BPF assemebler support in LLVM 6 we can easily test all compare instructions (LLVM 4 didn't generate most of them from C). Fix the compare to immediates and refactor the order of compare to regs to make sure they both follow the same pattern. Signed-off-by:
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Jakub Kicinski authored
We optimize comparisons to immediate 0 as if (reg.lo | reg.hi). The early return statement was missing, however, which means we would generate two comparisons - optimized one followed by a normal 2x 32 bit compare. Signed-off-by:
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Jakub Kicinski authored
ld_field instruction has the following format in NFP assembler: ld_field[dst, 1000, src, <<24] reoder parameters to emit_ld_field_any() to make it closer to the familiar assembler order. Signed-off-by:
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Jakub Kicinski authored
Use a simplified is_valid_access() callback when verifier is used for program analysis by non-host JITs. This allows us to teach the verifier about packet start and packet end offsets for direct packet access. We can extend the callback as needed but for most packet processing needs there isn't much more the offloads may require. Signed-off-by:
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David S. Miller authored
Jose Abreu says: ==================== net: stmmac: Improvements for multi-queuing and for AVB Two improvements for stmmac: First one corrects the available fifo size per queue, second one corrects enabling of AVB queues. More info in commit log. Cc: David S. Miller <davem@davemloft.net> Cc: Joao Pinto <jpinto@synopsys.com> Cc: Giuseppe Cavallaro <peppe.cavallaro@st.com> Cc: Alexandre Torgue <alexandre.torgue@st.com> Changes from v1: - Fix typo in second patch ==================== Signed-off-by:
Giuseppe Cavallaro <peppe.cavallaro@st.com>
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Jose Abreu authored
Flow control must be disabled for AVB enabled queues and TX AVB queues must be enabled by setting BIT(2) of TXQEN. Correct this by passing the queue mode to DMA callbacks and by checking in these functions wether we are in AVB performing the necessary adjustments. Signed-off-by:
Jose Abreu <joabreu@synopsys.com> Cc: David S. Miller <davem@davemloft.net> Cc: Joao Pinto <jpinto@synopsys.com> Cc: Giuseppe Cavallaro <peppe.cavallaro@st.com> Cc: Alexandre Torgue <alexandre.torgue@st.com> Signed-off-by:
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Jose Abreu authored
Currently we are using all the available fifo size in RQS and TQS fields. This will not work correctly in multi-queues IP's because total fifo size must be splitted to the enabled queues. Correct this by computing the available fifo size per queue and setting the right value in TQS and RQS fields. Signed-off-by:
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Matteo Croce authored
The ICMP implementation currently replies to an ICMP time exceeded message (type 11) with an ICMP host unreachable message (type 3, code 1). However, time exceeded messages can either represent "time to live exceeded in transit" (code 0) or "fragment reassembly time exceeded" (code 1). Unconditionally replying to "fragment reassembly time exceeded" with host unreachable messages might cause unjustified connection resets which are now easily triggered as UFO has been removed, because, in turn, sending large buffers triggers IP fragmentation. The issue can be easily reproduced by running a lot of UDP streams which is likely to trigger IP fragmentation: # start netserver in the test namespace ip netns add test ip netns exec test netserver # create a VETH pair ip link add name veth0 type veth peer name veth0 netns test ip link set veth0 up ip -n test link set veth0 up for i in $(seq 20 29); do # assign addresses to both ends ip addr add dev veth0 192.168.$i.1/24 ip -n test addr add dev veth0 192.168.$i.2/24 # start the traffic netperf -L 192.168.$i.1 -H 192.168.$i.2 -t UDP_STREAM -l 0 & done # wait send_data: data send error: No route to host (errno 113) netperf: send_omni: send_data failed: No route to host We need to differentiate instead: if fragment reassembly time exceeded is reported, we need to silently drop the packet, if time to live exceeded is reported, maintain the current behaviour. In both cases increment the related error count "icmpInTimeExcds". While at it, fix a typo in a comment, and convert the if statement into a switch to mate it more readable. Signed-off-by:Matteo Croce <mcroce@redhat.com> Signed-off-by:
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- 13 Oct, 2017 18 commits
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David S. Miller authored
Jon Maloy says: ==================== tipc: Introduce Communcation Group feature With this commit series we introduce a 'Group Communication' feature in order to resolve the datagram and multicast flow control problem. This new feature makes it possible for a user to instantiate multiple private virtual brokerless message buses by just creating and joining member sockets. The main features are as follows: --------------------------------- - Sockets can join a group via a new setsockopt() call TIPC_GROUP_JOIN. If it is the first socket of the group this implies creation of the group. This call takes four parameters: 'type' serves as group identifier, 'instance' serves as member identifier, and 'scope' indicates the visibility of the group (node/cluster/zone). Finally, 'flags' indicates different options for the socket joining the group. For the time being, there are only two such flags: 1) 'LOOPBACK' indicates if the creator of the socket wants to receive a copy of broadcast or multicast messages it sends to the group, 2) EVENTS indicates if it wants to receive membership (JOINED/LEFT) events for the other members of the group. - Groups are closed, i.e., sockets which have not joined a group will not be able to send messages to or receive messages from members of the group, and vice versa. A socket can only be member of one group at a time. - There are four transmission modes. 1: Unicast. The sender transmits a message using the port identity (node:port tuple) of the receiving socket. 2: Anycast. The sender transmits a message using a port name (type: instance:scope) of one of the receiving sockets. If more than one member socket matches the given address a destination is selected according to a round-robin algorithm, but also considering the destination load (advertised window size) as an additional criteria. 3: Multicast. The sender transmits a message using a port name (type:instance:scope) of one or more of the receiving sockets. All sockets in the group matching the given address will receive a copy of the message. 4: Broadcast. The sender transmits a message using the primtive send(). All members of the group, irrespective of their member identity (instance) number receive a copy of the message. - TIPC broadcast is used for carrying messages in mode 3 or 4 when this is deemed more efficient, i.e., depending on number of actual destinations. - All transmission modes are flow controlled, so that messages never are dropped or rejected, just like we are used to from connection oriented communication. A special algorithm guarantees that this is true even for multipoint-to-point communication, i.e., at occasions where many source sockets may decide to send simultaneously towards the same destination socket. - Sequence order is always guaranteed, even between the different transmission modes. - Member join/leave events are received in all other member sockets in guaranteed order. I.e., a 'JOINED' (an empty message with the OOB bit set) will always be received before the first data message from a new member, and a 'LEAVE' (like 'JOINED', but with EOR bit set) will always arrive after the last data message from a leaving member. ----- v2: Reordered variable declarations in descending length order, as per feedback from David Miller. This was done as far as permitted by the the initialization order. ==================== Signed-off-by: -
Jon Maloy authored
We already have point-to-multipoint flow control within a group. But we even need the opposite; -a scheme which can handle that potentially hundreds of sources may try to send messages to the same destination simultaneously without causing buffer overflow at the recipient. This commit adds such a mechanism. The algorithm works as follows: - When a member detects a new, joining member, it initially set its state to JOINED and advertises a minimum window to the new member. This window is chosen so that the new member can send exactly one maximum sized message, or several smaller ones, to the recipient before it must stop and wait for an additional advertisement. This minimum window ADV_IDLE is set to 65 1kB blocks. - When a member receives the first data message from a JOINED member, it changes the state of the latter to ACTIVE, and advertises a larger window ADV_ACTIVE = 12 x ADV_IDLE blocks to the sender, so it can continue sending with minimal disturbances to the data flow. - The active members are kept in a dedicated linked list. Each time a message is received from an active member, it will be moved to the tail of that list. This way, we keep a record of which members have been most (tail) and least (head) recently active. - There is a maximum number (16) of permitted simultaneous active senders per receiver. When this limit is reached, the receiver will not advertise anything immediately to a new sender, but instead put it in a PENDING state, and add it to a corresponding queue. At the same time, it will pick the least recently active member, send it an advertisement RECLAIM message, and set this member to state RECLAIMING. - The reclaimee member has to respond with a REMIT message, meaning that it goes back to a send window of ADV_IDLE, and returns its unused advertised blocks beyond that value to the reclaiming member. - When the reclaiming member receives the REMIT message, it unlinks the reclaimee from its active list, resets its state to JOINED, and notes that it is now back at ADV_IDLE advertised blocks to that member. If there are still unread data messages sent out by reclaimee before the REMIT, the member goes into an intermediate state REMITTED, where it stays until the said messages have been consumed. - The returned advertised blocks can now be re-advertised to the pending member, which is now set to state ACTIVE and added to the active member list. - To be proactive, i.e., to minimize the risk that any member will end up in the pending queue, we start reclaiming resources already when the number of active members exceeds 3/4 of the permitted maximum. Signed-off-by:
Jon Maloy <jon.maloy@ericsson.com> Acked-by:
Ying Xue <ying.xue@windriver.com> Signed-off-by:
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Jon Maloy authored
The following scenario is possible: - A user sends a broadcast message, and thereafter immediately leaves the group. - The LEAVE message, following a different path than the broadcast, arrives ahead of the broadcast, and the sending member is removed from the receiver's list. - The broadcast message arrives, but is dropped because the sender now is unknown to the receipient. We fix this by sequence numbering membership events, just like ordinary unicast messages. Currently, when a JOIN is sent to a peer, it contains a synchronization point, - the sequence number of the next sent broadcast, in order to give the receiver a start synchronization point. We now let even LEAVE messages contain such an "end synchronization" point, so that the recipient can delay the removal of the sending member until it knows that all messages have been received. The received synchronization points are added as sequence numbers to the generated membership events, making it possible to handle them almost the same way as regular unicasts in the receiving filter function. In particular, a DOWN event with a too high sequence number will be kept in the reordering queue until the missing broadcast(s) arrive and have been delivered. Signed-off-by:
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Jon Maloy authored
The following scenario is possible: - A user joins a group, and immediately sends out a broadcast message to its members. - The broadcast message, following a different data path than the initial JOIN message sent out during the joining procedure, arrives to a receiver before the latter.. - The receiver drops the message, since it is not ready to accept any messages until the JOIN has arrived. We avoid this by treating group protocol JOIN messages like unicast messages. - We let them pass through the recipient's multicast input queue, just like ordinary unicasts. - We force the first following broadacst to be sent as replicated unicast and being acknowledged by the recipient before accepting any more broadcast transmissions. Signed-off-by:
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Jon Maloy authored
We need a mechanism guaranteeing that group unicasts sent out from a socket are not bypassed by later sent broadcasts from the same socket. We do this as follows: - Each time a unicast is sent, we set a the broadcast method for the socket to "replicast" and "mandatory". This forces the first subsequent broadcast message to follow the same network and data path as the preceding unicast to a destination, hence preventing it from overtaking the latter. - In order to make the 'same data path' statement above true, we let group unicasts pass through the multicast link input queue, instead of as previously through the unicast link input queue. - In the first broadcast following a unicast, we set a new header flag, requiring all recipients to immediately acknowledge its reception. - During the period before all the expected acknowledges are received, the socket refuses to accept any more broadcast attempts, i.e., by blocking or returning EAGAIN. This period should typically not be longer than a few microseconds. - When all acknowledges have been received, the sending socket will open up for subsequent broadcasts, this time giving the link layer freedom to itself select the best transmission method. - The forced and/or abrupt transmission method changes described above may lead to broadcasts arriving out of order to the recipients. We remedy this by introducing code that checks and if necessary re-orders such messages at the receiving end. Signed-off-by:
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Jon Maloy authored
Group unicast messages don't follow the same path as broadcast messages, and there is a high risk that unicasts sent from a socket might bypass previously sent broadcasts from the same socket. We fix this by letting all unicast messages carry the sequence number of the next sent broadcast from the same node, but without updating this number at the receiver. This way, a receiver can check and if necessary re-order such messages before they are added to the socket receive buffer. Signed-off-by:
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Jon Maloy authored
The previously introduced message transport to all group members is based on the tipc multicast service, but is logically a broadcast service within the group, and that is what we call it. We now add functionality for sending messages to all group members having a certain identity. Correspondingly, we call this feature 'group multicast'. The service is using unicast when only one destination is found, otherwise it will use the bearer broadcast service to transfer the messages. In the latter case, the receiving members filter arriving messages by looking at the intended destination instance. If there is no match, the message will be dropped, while still being considered received and read as seen by the flow control mechanism. Signed-off-by:
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Jon Maloy authored
In this commit, we make it possible to send connectionless unicast messages to any member corresponding to the given member identity, when there is more than one such member. The sender must use a TIPC_ADDR_NAME address to achieve this effect. We also perform load balancing between the destinations, i.e., we primarily select one which has advertised sufficient send window to not cause a block/EAGAIN delay, if any. This mechanism is overlayed on the always present round-robin selection. Anycast messages are subject to the same start synchronization and flow control mechanism as group broadcast messages. Signed-off-by:
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Jon Maloy authored
We now make it possible to send connectionless unicast messages within a communication group. To send a message, the sender can use either a direct port address, aka port identity, or an indirect port name to be looked up. This type of messages are subject to the same start synchronization and flow control mechanism as group broadcast messages. Signed-off-by:
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Jon Maloy authored
We introduce an end-to-end flow control mechanism for group broadcast messages. This ensures that no messages are ever lost because of destination receive buffer overflow, with minimal impact on performance. For now, the algorithm is based on the assumption that there is only one active transmitter at any moment in time. Signed-off-by:
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Jon Maloy authored
Like with any other service, group members' availability can be subscribed for by connecting to be topology server. However, because the events arrive via a different socket than the member socket, there is a real risk that membership events my arrive out of synch with the actual JOIN/LEAVE action. I.e., it is possible to receive the first messages from a new member before the corresponding JOIN event arrives, just as it is possible to receive the last messages from a leaving member after the LEAVE event has already been received. Since each member socket is internally also subscribing for membership events, we now fix this problem by passing those events on to the user via the member socket. We leverage the already present member synch- ronization protocol to guarantee correct message/event order. An event is delivered to the user as an empty message where the two source addresses identify the new/lost member. Furthermore, we set the MSG_OOB bit in the message flags to mark it as an event. If the event is an indication about a member loss we also set the MSG_EOR bit, so it can be distinguished from a member addition event. Signed-off-by:
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Jon Maloy authored
With group communication, it becomes important for a message receiver to identify not only from which socket (identfied by a node:port tuple) the message was sent, but also the logical identity (type:instance) of the sending member. We fix this by adding a second instance of struct sockaddr_tipc to the source address area when a message is read. The extra address struct is filled in with data found in the received message header (type,) and in the local member representation struct (instance.) Signed-off-by:
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Jon Maloy authored
As a preparation for introducing flow control for multicast and datagram messaging we need a more strictly defined framework than we have now. A socket must be able keep track of exactly how many and which other sockets it is allowed to communicate with at any moment, and keep the necessary state for those. We therefore introduce a new concept we have named Communication Group. Sockets can join a group via a new setsockopt() call TIPC_GROUP_JOIN. The call takes four parameters: 'type' serves as group identifier, 'instance' serves as an logical member identifier, and 'scope' indicates the visibility of the group (node/cluster/zone). Finally, 'flags' makes it possible to set certain properties for the member. For now, there is only one flag, indicating if the creator of the socket wants to receive a copy of broadcast or multicast messages it is sending via the socket, and if wants to be eligible as destination for its own anycasts. A group is closed, i.e., sockets which have not joined a group will not be able to send messages to or receive messages from members of the group, and vice versa. Any member of a group can send multicast ('group broadcast') messages to all group members, optionally including itself, using the primitive send(). The messages are received via the recvmsg() primitive. A socket can only be member of one group at a time. Signed-off-by: -
Jon Maloy authored
We often see a need for a linked list of destination identities, sometimes containing a port number, sometimes a node identity, and sometimes both. The currently defined struct u32_list is not generic enough to cover all cases, so we extend it to contain two u32 integers and rename it to struct tipc_dest_list. Signed-off-by:
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Jon Maloy authored
We see an increasing need to send multiple single-buffer messages of TIPC_SYSTEM_IMPORTANCE to different individual destination nodes. Instead of looping over the send queue and sending each buffer individually, as we do now, we add a new help function tipc_node_distr_xmit() to do this. Signed-off-by:
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Jon Maloy authored
In the following commits we will need to handle multiple incoming and rejected/returned buffers in the function socket.c::filter_rcv(). As a preparation for this, we generalize the function by handling buffer queues instead of individual buffers. We also introduce a help function tipc_skb_reject(), and rename filter_rcv() to tipc_sk_filter_rcv() in line with other functions in socket.c. Signed-off-by:
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Jon Maloy authored
In the coming commits, functions at the socket level will need the ability to read the availability status of a given node. We therefore introduce a new function for this purpose, while renaming the existing static function currently having the wanted name. Signed-off-by:
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Jon Maloy authored
The address given to tipc_connect() is not completely sanity checked, under the assumption that this will be done later in the function __tipc_sendmsg() when the address is used there. However, the latter functon will in the next commits serve as caller to several other send functions, so we want to move the corresponding sanity check there to the beginning of that function, before we possibly need to grab the address stored by tipc_connect(). We must therefore be able to trust that this address already has been thoroughly checked. We do this in this commit. Signed-off-by:
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