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|Número de publicación
|Tipo de publicación
|Número de solicitud
|Fecha de publicación
|16 May 2000
|Fecha de presentación
|11 Jun 1997
|Fecha de prioridad
|27 Jun 1996
|Número de publicación
|Christopher J. Kappler, Landis C. Rogers, J. Bryan Lyles
|Cesionario original
|Xerox Corporation
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|BiBTeX, EndNote, RefMan
|Citas de patentes (7), Otras citas (8), Citada por (81), Clasificaciones (21), Eventos legales (6)
|Enlaces externos: USPTO, Cesión de USPTO, Espacenet
Pursuant to 35 U.S.C.120, the priority of the inventors's earlier filed provisional application filed on Jun. 27, 1996 under Ser. No. 60/020,642 is claimed.
This invention relates to packet switched communication networks and, more particularly, to traffic shaping for causing the time multiplexed packet flows at queuing points within such networks or network elements to conform to specified traffic descriptors.
For other concurrent filings on traffic shaping see Attorney Docket No. D/96271P by Christopher J. Kappler et al., entitled "Multiple Rate Sensitive Priority Queues for Reducing Relative Data Transport Unit Delay Variations in Time Multiplexed Outputs from Output Queued Routing Mechanisms," Attorney Docket No. D/96271Q1P by Landis C. Rogers et al., entitled "Rate Shaping in Per-Flow Output Queued Routing Mechanisms for Statistical Bit Rate Service," Attorney Docket No. D/96271Q2P by Joseph B. Lyles et al., entitled "Rate Shaping in Per-Flow Queued Routing Mechanisms for Available Bit Rate Service," Attorney Docket No. D/96271Q3P by Joseph B. Lyles, entitled "Rate Shaping in Per-Flow Output Queued Routing Mechanisms for Available Bit Rate (ABR) Service in Networks Having Segmented ABR Control Loops," Attorney Docket No. D/96271Q4P by Joseph B. Lyles et al., entitled "Rate Shaping in Per-Flow Output Queued Routing Mechanisms for Unspecified Bit Rate Service."
A. Traffic Contracts/Definitions
Most applications that are currently running on packet switched communication networks can function acceptably with whatever bandwidth they happen to obtain from the network because they have "elastic" bandwidth requirements. The service classes that support these applications is known as "best efforts" service in the Internet community and as "Available Bit Rate" (ABR) in the Broadband ISDN/ATM community.
There is, however, a growing demand for network services that provide bounded jitter or, in other words, bounded packet delay variation (commonly referred to as cell delay variation in an ATM context). For example, this type of service is required for real time applications, such as circuit emulation and video. It is not clear whether and how the Internet community will respond to this demand, but the Broadband ISDN/ATM community has responded by introducing the notion of a user-network negotiated traffic contract.
As is known, a user-network ATM contract is defined by a traffic descriptor which includes traffic parameters, tolerances and quality of service requirements. A conformance definition is specified for each of the relevant traffic parameters. Accordingly, ATM services may make use of these traffic parameters and their corresponding conformance specifications to support different combinations of Quality of Service (QoS) objectives and multiplexing schemes.
Partially overlapping sets of ATM traffic classes have been defined by the Telecommunications Standardization Sector of the International Telecommunications Union (ITU-T) and the ATM Forum. In some instances, traffic classes which have essentially identical attributes have been given different names by these two groups, so the following name translation table identifies the existing equivalent counterparts:
______________________________________ITU-T Traffic Class ATM Forum Traffic Class______________________________________ABR ABRDeterministic Bit Rate (DBR) Constant Bit Rate (CBR)Statistical Bit Rate (SBR) Variable Bit Rate (VBR)(No existing counterpart, but Real time Variable Bit Rate (rt-VBR)understudy)(No existing counterpart, but Unspecified Bit Rate (UBR)understudy)______________________________________
An ATM service contract for a virtual circuit (VC) connection or a virtual path (VP) connection may include multiple parameters describing the service rate of the connection. This includes the Peak Cell Rate (PCR), the Sustainable Cell Rate (SCR) the Intrinsic Burst Tolerance (IBT), and the Minimum Cell Rate (MCR). Not all of these parameters are relevant for every connection or every service class, but when they are implied or explicitly specified elements of the service contract, they must be respected. VC connections are the primary focus of the following discussion, but it will be understood the VP connections can also be so specified. The data transport unit for an ATM connection usually is referred to as a "cell." In this disclosure, however, the term "packet" is sometimes used to refer to the data transport unit because this more general terminology is consistent with some of the broader aspects of the innovations.
The Generic Cell Rate Algorithm (GCRA), which is specified in ITU-T Recommendation 1.371, is well suited for testing a packet or cell flow for conformance with a traffic descriptor. To perform such testing, the GCRA requires the specification of an emission interval (i.e., the reciprocal of a flow rate) and a tolerance, τ. In practice, this tolerance may depend on a variety of factors, including the connection, the connection setup parameters, or the class of service. As will be seen, the GCRA can be employed as a Boolean function, where for a flow of fixed size packets or cells on a connection, the GCRA (emission interval, tolerance) is false if the flow is conforming to a peak rate or true if the flow is conforming to a minimum rate. For example, a source of cells conforms to a PCR if GCRA (1/PCR, τPCR ) is false. Likewise, a connection or flow conforms to an MCR if GCRA (1/MCR, τMCR) is false. As will be appreciated the "emission interval" is the reciprocal of the "cell rate."
A DBR traffic contract is appropriate for a source which establishes a connection in the expectation that a static amount of bandwidth will be continuously available to the connection throughout its lifetime. Thus, the bandwidth the network commits to a DBR connection is characterized by a PCR value. Further, the cell or packet flow on such a connection complies with the traffic contract if it conforms to GCRA (1/PCR, τPCR). On the other hand, an SBR traffic contract is suitable for an application which has known traffic characteristics that allow for an informed selection of an SCR and τIBT, as well as a PCR and τPCR. An SBR or rt-SBR flow complies with its traffic contract if the flow not only conforms to GCRA (1/PCR, τPCR), but also to GCRA (1/SCR, τIBT)
As previously indicated, an ABR traffic contract is appropriate for applications that can tolerate the dynamic variations in the information transfer rate that result from the use of unreserved bandwidth. A PCR and an MCR are specified by the source establishing such a connection, and these parameters may be subject to negotiation with the network. Thus, the bandwidth that is available on an ABR connection is the sum of the MCR (which can be 0) and a variable cell rate that results from a sharing of unreserved bandwidth among ABR connections via a defined allocation policy (i.e., the bandwidth a source receives above its specified MCR depends not only on the negotiated PCR, but also on network policy). Feedback from the network enables the source application to dynamically adjust the rate it feeds cells or packets into an ABR connection. An ABR flow always complies with its traffic contract if it conforms to GCRA (1/MCR, τMCR), and is always non-compliant if it does not conform to GCRA (1/PCR, τPCR). Conformance in the region between MCR and PCR is dependent on the ABR feedback and is thus dynamically determined.
A UBR traffic contract is similar to the ABR contract, except that the UBR contract does not accommodate the specification of an MCR and has no dynamic conformance definition. Therefore, a UBR flow complies with its traffic contract if it conforms to GCRA (1/PCR, τPCR).
B. Traffic Shaping
ITU-T Recommendation I .371 addresses the possibility of reshaping traffic at a network element for the purpose of bringing the traffic into conformance with a traffic descriptor in the following terms:
"Traffic shaping is a mechanism that alters the traffic characteristics of a stream of cells on a VCC or a VPC to achieve a desired modification of those traffic characteristics, in order to achieve better network efficiency whilst meeting the QoS objectives or to ensure conformance at a subsequent interface. Traffic shaping must maintain cell sequence integrity on an ATM connection. Shaping modifies traffic characteristics of a cell flow with the consequence of increasing the mean cell transfer delay.
Examples of traffic shaping are peak cell rate reduction, burst length limiting, reduction of CDV by suitably spacing cells in time and queue service schemes.
It is a network operator's choice to determine whether and where traffic shaping is performed. As an example, a network operator may choose to perform traffic shaping in conjunction with suitable UPC/NPC functions.
It is an operator's option to perform traffic shaping on separate or aggregate cell flows.
As a consequence, any ATM connection may be subject to traffic shaping.
The options available to the network operator/service provider are the following:
a. No shaping
Dimension the network in order to accommodate any flow of conforming cells at the network ingress whilst ensuring conformance at the network egress without any shaping function.
b. Shaping
Dimension and operate the network so that any flow of conforming cells at the ingress is conveyed by the network or network segment whilst meeting QoS objectives and apply output shaping the traffic in order to meet conformance tests at the egress.
Shape the traffic at the ingress of the network or network segment and allocate resources according to the traffic characteristics achieved by shaping, whilst meeting QoS objectives and subsequent conformance tests at the network or network segment egress.
Traffic shaping may also be used within the customer equipment or at the source in order to ensure that the cells generated by the source or at the UNI are conforming to the negotiated traffic contract relevant to the ATC that is used (see Section 5.5)." ITU-T Recommendation I .371, Section 6.2.5.
C. Scheduling for Real Time and Non-Real Time Connections/Existing Tools and Techniques
As is known, if bandwidth is not divided "fairly" between applications employing "best efforts" Internet service or ABR ATM service a variety of undesirable phenomena may occur. See Lefelhocz, Lyles, Shenker and Zhang, "Congestion Control for Best-Effort Service: Why we need a new paradigm,"IEEE Network, January/February 1996, for further details on mechanisms for best effort/ABR traffic.
Most ATM switches currently are implemented with FIFO queuing. FIFO queuing exhibits pathological behaviors when used for ABR traffic (see "On Traffic Phase Effects in Packet-Switched Gateways", Sally Floyd and Van Jacobson, Internetworking: Research and Experience, Vol. 3, pp. 115-156 (1992), and "Observations on the Dynamics of a Congestion Control Algorithm: The effects of Two-Way Traffic", Lixia Zhang, Scott Shenker, and David Clark, ACM Sigcomm 91 Conference, Sep. 3-6, 1991, Zurich, Switzerland, pp. 133-148.). FIFO also is unable to protect correctly behaving users against misbehaving users (it does not provide isolation). As a result of these deficiencies non-FIFO queuing mechanisms such as weighted fair queuing (see, for example, A. Demers, S. Keshave, and S. Shenker, "Analysis and Simulation of a Fair Queuing Algorithm," Proceedings of ACM SiqComm, pages 1-12, September 1989; and A. K. Parekh "A Generalized Processor Sharing Approach to Flow Control in Integrated Service Networks," Ph.D. Thesis, Department of Electrical Engineering and Computer Science, MIT, 1992.) or approximations to fair queuing such as round-robin (Ellen L. Hahne, "Round-robin Scheduling for Max-Min Fairness in Data Networks," IEEE Journal on Selected Areas in Communications, Vol. 9, pp.1024-1039, September 1991.) are often suggested.
Service classes which have inelastic bandwidth requirements often require that data be transmitted through the network with bounded jitter (i.e., bounded cell or packet delay variation). As shown by the above referenced Parekh paper, weighted fair queuing can be used to provide bounded jitter for real time streams. Moreover, Parekh's results have recently (Pawan Goyal, Simon S. Lam and Harrick M. Vin, "Determining End-to-End Delay Bounds in Heterogeneous Networks," Proceedings of The 5th International Workshop on Network and Operating System Support for Digital Audio and Video(NOSSDAV), Durham, N.H., Apr. 18-22, 1995.) been extended to prove delay bounds for systems using the closely related mechanisms of Virtual Clock (Lixia Zhang, "Virtual Clock: A New Traffic Control Algorithm for Packet Switching Networks," Proceedings of ACM SigComm, pages 19-29, August 1990.) and Self-clocked Fair Queuing (S. J. Golestani, "A Self-Clocked Fair Queuing Scheme for High Speed Applications," Proceedings of INFOCOM, pp. 636-646, 1994).
Thus, it is known that both elastic (Best effort/ABR) and inelastic (or real-time) services can benefit from the use of fair queuing and related algorithms.
1. Weighted Fair Queuing and Virtual Clock
Fair queuing and related algorithms (e.g., frame-based fair queuing, deficit round robin, etc.) operate on sequences of packets or other data transport units (e.g., an ATM cell is a packet). For ATM these sequences are identified by either the VCI or the VPI, while in the Internet protocol suite the identification is on the basis of <IP address, protocol, port>triples (IPv4) or flow identifiers (IPv6). In both self-clocked weighted fair queuing and virtual clock, packets are ordered (sorted) by timestamps (schemes such as round-robin provide approximations to ordering of packets by timestamps). These timestamps represent the virtual finishing time (or equivalently the virtual starting time for the packet and are computed by taking a starting time value and adding an offset obtained by multiplying the length of the packet by a weight which represents the particular packet sequence's share of the bandwidth.
More particularly, for virtual clock the virtual finishing time is computed as:
VT(f, 0)=0
VT(f, j+1)=max{Arrival(f, j+1), VT(f, j)}+Length(f, j+1)/Rate(f)(1)
where: VT(f, j) is the virtual finishing time associated with packet j of flow (virtual circuit) f;
Arrival(f, j) is the arrival time of packet j of flow f; and
Length(f, j) is the length of packet j of flow f.
Self-clocked weighted fair queuing assigns virtual finishing times according to the formula:
VT(f, 0)=0
VT(f, j+1)=max{SystemVirtualTime, VT(f, j)}+Length(f, j+1) * weight(f)(2)
where: SystemVirtualTime is the virtual time associated with the packet being served (being output) at the time packet(f, j+1) arrives.
For ATM the packet length is constant because the cells are of fixed size (i.e., 53 bytes long). Consequently, rightmost term in both Expression (1) and Expression (2) becomes a per flow constant. For virtual clock the simplified expression is:
VT(f, j+1)=max{Arrival(f, j+1), VT(f, j)}+constant(f) (3)
For self-clocked weighted fair queuing, on the other hand, the simplified expression is:
VT(f, j+1)=max{SystemVirtualTime, VT(f, j)}+constant (f) (4)
In other words, an ATM queuing point which implements either virtual clock or self-clocked weighted fair queuing performs the following steps:
1) compute the maximum of (a) the current virtual time for the VC, and (b) either of i) the arrival time of the cell or ii) the system virtual time.
2) add to the results of step 1 above a per-VC constant representing that VC's share of the bandwidth.
3) service cells (transmit them) in order of increasing values of the virtual time stamps assigned by steps 1 and 2.
2. Priority
Giving priority to one traffic class over another means that if the higher priority traffic class has cells ready for transmission, those cells are always transmitted in preference to the cells of the lower priority traffic class.
Priority mechanisms can be either preemptive or non-preemptive. This terminology comes from the operating system literature. A non-preemptive priority mechanism assigns a priority to an object (a process in the operating system world, a VC in the ATM world) at a scheduling time, and the object then retains this priority until it is served. Preemptive priority mechanisms, on the other hand, can change the priority of objects while they are waiting to be served. For example, in a preemptive system one could say "schedule this VC with priority 3 but if it is not served within 200 microseconds then increase its priority up to 2."
3. Work Conserving and Non-work Conserving Queuing
Kleinrock, Queuing Systems, Vol. 2: Computer Applications, John Wiley & Sons, N.Y., N.Y. 1996, p. 113 uses the terminology "work conserving" to denote any queuing system in which work is neither created nor destroyed. In keeping with this terminology a switch which, when given queued cells, always transmits cells on the outgoing link is a "work conserving switch". Switches employing a pure FIFO, weighted fair queuing or virtual clock scheduling algorithm are all work conserving. In contrast, a non-work conserving switch may choose not to send cells, even when cells are queued for transmission. As will be seen, a method of doing this is to program the switch to wait until the current time is equal to or greater than the timestamp associated with a particular cell before transmitting that cell.
Work conserving switches attempt to fully utilize the transmission link, but do not necessarily remove or prevent bursts. In contrast, non-work conserving switches can strategically delay cells so as to re-shape traffic to meet a more stringent conformance test (i.e., a GCRA with a smaller τ). Additionally, a non-work conserving switch in which a given connection is only allocated a specified amount of buffering can perform a policing function (in ITU terms a UPC/NPC) by discarding or tagging cells which overflow the allotted buffer space. An example of a non-work conserving queuing system is the Stalled Virtual Clock (Sugih Jamin, "Stalled Virtual Clock" working note, Department of Computer Science, UCLA, Mar. 21, 1994), which is an adaptation of Lixia Zhang's Virtual Clock algorithm where virtual time is not allowed to run faster (it stalls or goes non-work conserving) than real-time. Also see, work by Scott Shenker that is available by FTP at FTP.PARC.XEROX.com.
4. Calendar Queues
A calendar queue is a time ordered list of actions, each of which is dequeued and executed when real-time is equal to or greater than the time associated with the action. Calendar queues with bounded time intervals can be represented as a linear array which is known as a "lime-wheel" or "time-line." Time-wheels assign events to buckets relative to a pointer, where the bucket index is calculated using arithmetic modulo the wheel size. These data structures are well known in the literature as a queuing mechanism. In a time-wheel, absolute time is represented as an offset relative to the current time ("real time"), and each element in the array is a bucket which contains one or more actions (typically in linked-list form) which are to be executed at the time assigned to the bucket in which they reside. Any of the buckets of such a time-wheel can be empty, i.e., have no events associated with it.
For every time-wheel, there are two times of interest: tearliest and tlatest, which correspond to the head and tail pointers for the active entries in the array; where tearliest is the time of the next entry (e.g., packet or cell) to be serviced, and tlatest is the time associated with the latest (most distant in time) bucket containing a scheduled event. The difference between tearliest and tlateat cannot be greater than the length of the time-wheel, b, minus 1. This can be ensured by viewing the time as being kept modulo b, and by then ensuring that no offset (the packet length multiplied by either the rate or the weight in virtual clock or weighted fair queuing respectively) is greater than b-1. For an ATM link running at OC-3 speeds (149.76 mbps--the SONET payload rate) there are approximately 353208 cells/sec on the link. Accordingly, if 64 Kbps (voice telephony rates) flows (approximately 174 cells/sec when AAL type 1 is used) are the lowest speed connections that need to be supported, then the ratio of the highest supported rate to the lowest rate is 2029, which rounds up to 211. This ratio is the maximum offset that will get added during the calculation of virtual times. Therefore, a time-wheel of length 2030 (2048 to allow for rounding up to a power of two) is sufficient to encode the virtual times associated with circuits ranging in rates from 64 Kbps to full OC-3 link rate.
The length of a time-wheel array can be decreased by permitting an array element to contain more than one time offset. For example, if the above-described time-wheel is reduced to 256 elements from 2048, then each bucket would have eight time offsets mapped into it. Actions within a single bucket that spans multiple offsets may be performed out of order, but between buckets actions will stay in order. This reduces the amount of memory that needs to be allocated to such a time-wheel at the cost of reducing the precision of the ordering of actions in the calendar queue.
D. Traffic Shaping for Time Multiplexed Flows on Multiple Output Channels
Preferably, any traffic shaping that is needed to bring time multiplexed packet or cell flows into conformance with their traffic contracts is performed after the completion of all switching or routing operations that are required to separate flows for different output channels from each other. This permits the throughput efficiency of the multiplexer to be optimized.
However, prior output queued ATM switches generally have employed FIFO (First In--First Out) output buffers. These buffers are not capable of participating in a controlled reshaping of any of the flows that pass through them. Instead, the per-VC time multiplexed flows that are output by these buffers essentially are time multiplexed composites of the input flows that are loaded into them. Of course, these output flows are time delayed relative to the input flows because of the inherent latency of the buffers. Moreover, the cell delay variation (CDV) of one or more of these output flows may be increased if scheduling conflicts occur among the data transport limits of the different flows because these conflicts cause so-called "transmit collisions."
As will be appreciated, increased CDV is especially troublesome for traffic, such as DBR traffic, which generally has a relatively tight tolerance. Thus, if each hop between a source and a destination includes a simple FIFO output queue of the foregoing type, it may be necessary to limit the number of hops this CDV sensitive traffic is permitted to make in order to ensure compliance within its specified tolerance.
Accordingly, that there is a need for more efficient and more effective traffic shaping mechanisms and processes for ATM switches and other routers that route traffic from multiple inputs to multiple outputs for time multiplexed output emission.
This invention provides rate shaping in per-flow output queued routing mechanisms having output links servicing multiple physical layers.
Still further objects and advantages of this invention will be evident when the following details and description is read in conjunction with the attached drawings, in which:
FIG. 1 is a simplified block diagram of an ATM switch in which the present invention may be used to advantage;
FIG. 2 diagrammatically tracks the various shapes an ATM cell may suitably take while traversing the switch shown in FIG. 1;
FIG. 3 is a more detailed block diagram of a representative channel on the output or transmit side of the chip shown n FIG. 1;
FIG. 4 schematically illustrates a stalled virtual clock calendar queue technique for shaping SBR traffic;
FIG. 5 schematically illustrates another stalled virtual clock calendar queue technique for shaping SBR traffic;
FIG. 6 schematically illustrates a stalled virtual clock calendar queue technique for shaping ABR traffic having MCR guarantees;
FIG. 7 schematically illustrates another stalled virtual clock calendar queue technique for shaping ABR traffic having MCR guarantees;
FIG. 8 schematically illustrates still another stalled virtual clock calendar queue technique for shaping ABR traffic having MCR guarantees;
FIG. 9 schematically an ABR connection having a source-to-destination control loop;
FIG. 10 schematically an ABR connection having segmented control loop;
FIG. 11 schematically illustrates an output link servicing multiple physical layers; and
FIG. 12 schematically illustrates a calendar queue time-line that is striped with multiple physical layer significance.
While the invention is described in some detail hereinbelow with specific reference to certain embodiments, it is to be understood that there is no intent to limit it to those embodiments. On the contrary, the intent is to cover all modifications, alternatives and equivalents falling within the spirit and scope of the invention as defined by the appended claims.
A. A Representative Environment
Turning now to the drawings, and at this point especially to FIG. 1, the input and output ports of an ATM switch 21 typically are coupled to one or more physical layers via respective Utopia 2 interfaces and to a switch control processor module 22 via a second suitable interface. This enables the switch 21 to exchange data and control cells with any physical layers that are connected to them, and to also exchange control cells with the control processor module 22. In keeping with standard practices, the communication channels are unidirectional, so a pair of channels are required for bi-directional communications.
The switch 21 comprises a switching fabric 24, a fabric control module 26 and a reservation ring 26 for switching data and control cells from input queues to per-VC output queues. The cells in these queues are stored in the data path in data memory 27, and these input and output queues are managed by a queue control module 28. Typically, the data memory 27 is sized to hold up to roughly 12000 cells. Connection records for the data and control cell flows are stored in the control path in control memory 29, together with certain types of control cells which are intercepted by a rate based engine and traffic multiplexer 31 for routing to the control processor module 22. Suitably, the control RAM 29 is capable of accommodating up to about 8200 connection records and 64 k cell records. The interaction of the control processor module 22 with the switch 21 is beyond the scope of the present invention and, therefore, is not described herein. However, persons who are familiar with ATM switch design will understand that the control processor is primarily responsible for performing connection establishment and termination, as well as OAM (Operation and Maintenance) functions.
The data path of the switch 21 is synchronously clocked (by means not shown) at a predetermined rate of, say, 40 MHz. However, in keeping with conventional synchronous pipeline design practices, the phase of this clock signal is delayed (by means also not shown) by differing amounts at different points along the data path to give the data adequate time to settle prior to being transferred from one pipelined stage to the next.
In accordance with standard practices, a source wishing to communicate with a destination initiates negotiations with the ATM network within which the switch 21 resides by sending a SETUP message to the network. This message identifies the destination and explicitly or impliedly specifies all of the relevant traffic parameters for the requested connection. If the network is prepared to commit to the traffic contract which is defined by these traffic parameters (or a modified version of the parameters that the source is willing to accept), the network routes the SETUP message to the destination. Then, if the destination is ready to receive message traffic from the source in accordance with the terms of the traffic contract, the destination returns a CONNECT message to the source. This CONNECT message confirms that a connection has been established on a specified virtual circuit (VC) within a specified virtual path (VP) for a cell flow that conforms to the traffic contract. See ITU-T Recommendation 0.2391 and ATM Forum UNI 4.0 Specification. "Permanent" virtual connections can be established by provisioning, without invoking these signaling protocols.
Data cells begin to flow after a connection is established. As shown in FIG. 2, the form of the cells change as they pass through the switch 21 because of the operations. the switch performs. Cells may be replicated within the switch 21 for multicasting, but the following discussion will be limited to unicast operations to avoid unnecessary complexity.
As indicated in FIG. 2 at 41, each inbound cell that the switch 21 receives has a header containing a VP index and a VC index. These indices combine to define a unique address for one hop of the connection. A connection may be composed of multiple hops, so the VP and VC indices for the next hoop are written into the header of the cell as it passes through the switch 21 as indicated in FIG. 2 at 42.
The switch 21 employs the VP and VC indices of the inbound cell (FIG. 2 at 41) to compute the address at which the connection record for the associated flow resides within the control RAM 29. Typically, this connection record includes a bit vector for identifying the output port (i.e., the switch-level "destination") at which the flow exits the switch 21, a priority index for identifying the relative priority of the flow on a granular priority scale, and a circuit index ("Circuit Index") which uniquely identifies the flow internally of the switch 21. As shown in FIG. 2 at 43, these connection parameters are written into the cell header. Then, the cell is written into the data RAM memory 27, while a pointer to the cell is linked into an appropriate one of a plurality of FIFO input queues, where the selection of the queue is based on the priority of the related flow.
The relative priorities of the head of queue cells within these input queues are examined during each cell time, and the head of queue cell having the highest priority is selected for arbitration during the next arbitration session. Furthermore, the priority of any lower priority head of queue cell (i.e., any non-selected head of queue cell) is incrementally increased (by means not shown), thereby increasing the probability of that cell being selected for arbitration during the next arbitration session. Therefore, even though the higher priority input queues have greater throughput per unit time than the lower priority queues, the lower priority queues have bounded delay because the priority of their head of queue cells increases as a function of time.
Each arbitration cycle requires one cell time of the switch 21, so the routing information for the cells that are selected for arbitration is fed into the reservation ring 26 one cell time prior to the release into the switching fabric 24 of the pay loads of the cell or cells that win the arbitration. In other words, as shown in FIG. 2 at 44, the cells that are received by the reservation ring 26 and switching fabric 24 are composed of the headers of the cells for the next arbitration cycle (i.e., the "current cells") followed by the bodies or payloads of the cells successfully arbitrated during the previous arbitration cycle (i.e., the "previous cells"). Thus, when the cell bodies reach the fabric 25, the fabric is already configured by the fabric control 25 to route those cells to their respective output port destination. For additional information on the reservation ring 26 and the arbitration it performs, see Cisneros, A., "Large Packet Switch and Contention Resolution Device," Proceedings of the XIII International Switching Symposium, 1990, paper 14, Vol. III, pp. 77-83 and Lyles U.S. Pat. No. 5,519,698, which issued May 21, 1996.
In the illustrated embodiment, cells are decomposed into four bit wide nibbles for arbitration and routing. Thereafter (with the exception of "idle cells" that may be provided for testing the switching processes) the cells are reassembled and queued in the data path, the control path, or both (a) for time scheduled transfer to the appropriate output ports of the switch 21 and/or (b) for transfer to the control processor module 22. The time scheduled transfer of cells to the output ports of the switch 21 is central to this invention so that subject is discussed in further detail hereinbelow. On the other hand, the decomposition and reassembly of the cells, the testing processes, and the interaction of the control processor 22 with RM (Resource Management) and OAM (Operation and Maintenance) cells are incidental topics which need not be considered in depth.
Referring to FIG. 3, it will be understood that the switch 21 fans out on the output or transmit side of the switching fabric 24. Thus, while one output channel of the switch 21 is shown, it will be understood that this channel is generally representative of the other channels.
As shown, there suitably is a fill cells module 51 for accepting cell bodies and their associated circuit indices from the switching fabric 24. The "effective cell time" on the output side of the switching fabric 24 is determined by the ratio of the nominal cell time to the "k" speed-up factor. Thus, for example, if the nominal cell time is 113 clock cycles/cell, the effective cell time on the output side of the switching fabric 24 is 56.5 cycles/cell if k=2.
When a valid cell is received, the fill cell module 51 typically uses cell structures from a linked and numbered free list 52 of such data structures for writing the cell into the data memory 27. To that end, the fill cell module 51 suitably includes a fetch state machine 53 for fetching cell structures form the top of the free list 52 on demand. This enables the fill cell module 51 to insert the circuit index for the cell and a pointer to the location of the cell in data memory 27 into an "arrival" message that it sends to notify a cell flow control unit 55 of the cell's arrival. The circuit index enables the flow control unit 55 to ascertain the VC or flow to which the cell belongs from the connection record in the control memory 29. This, in turn, enables the cell flow control unit 55 to check the traffic shaping status of the flow. An OAM/RM recognizer 27 advantageously is provided to enable the flow control unit 55 to identify these control cells and to determine whether they are to be queued in the data path, the control path, or both.
The memory pointers for cells of traffic contract compliant flows are queued in per-VC queues in response to "addCell" messages which the cell flow control unit 55 sends to a queue control unit 58. Each addCell message identifies the cell to which it pertains and the circuit index for the associated flow or VC. Moreover, the addCell message also indicates whether the cell is to be queued in the data path, the control path, or both. When the cell has been appropriately queued, the queue control unit 58 returns an "added" message to the cell flow control unit 55 for notifying the flow control unit 55 that the newly queued cell needs to be taken into account during future rate shaping computations on the VC to which it belongs.
Advantageously, the queue control unit 58 monitors the length of the per-VC queues with respect to the depth control limits that are set on the respective queues. This enables the queue control unit 58 to initiate congestion control action on ABR flows when their per-VC queues become excessively long. It also permits the queue control unit 58 to identify flows that are exceeding their traffic contract so that an appropriate policing function (not shown) can be invoked to drop or log cells of such non-compliant flows.
An admission controller 61 monitors the "added" messages that are returned by the queue control unit 58 to cause a scheduler 62 to schedule the head of queue cells for the non-empty per-VC queues on a calendar queue 63 for transmission at scheduled times. Suitably, the scheduler 62 employs a per-VC virtual clock to schedule these head of queue cells on the calendar queue 63 in accordance with respective virtual finishing times, VT(f, j+1), that the scheduler 62 computes for them (or, alternatively, "virtual start times"). Please see Section III.C.1 above.
The calendar queue 63 tracks system "real time" or "current time" to prevent any of the scheduled cells from being released for transmission prior to its scheduled time. In other words, the scheduler 62 and the calendar queue 63 implement a stalled virtual clock so that the cells that are scheduled for transmission are released for transmission only when system real time has at least reached their respective scheduled transmission times. As illustrated, connections having cells that have been released for transmission by the calendar queue 63 are linked into a link list of connections that have cells ready for transmission on a transmit list 65.
The calendar queue 63 notifies the flow control unit 55 whenever it releases a cell for transmission on any given connection. The flow control unit 55, in turn, requests the reference to the next cell (i.e., the new head of queue cell), if any, on the per-VC queue for the given connection and notifies the admission controller 61 that it should admit this reference to the scheduler 62 for scheduling. Thus, the admission controller 61 effectively engages in closed loop communications with the calendar queue 63 to ensure that the head of queue cells which it admits for scheduling thereon are admitted to the exclusion of all other cells in the per-VC queues. Thus, the calendar queue 63 may be implemented by employing one or more time bounded time-wheels or "time lines," 66. Please see Section III.C.4 above. The time span of these time-wheels must be at least as long as the period of the lowest frequency flows that the system is designed to support to prevent time wrap induced ambiguities and preferably is twice as long so relative times can be compared using two's complement computations.
B. Shaping Flows of Fixed Bit Length Data Transport Limits to Specified Peak Flow Rates
Referring to FIG. 4, it will be evident that stalled virtual clock transmission control is well suited for shaping time multiplexed flows of fixed bit length data transport units, such as ATM cells, from an output queued routing mechanism to specified peak data unit flow rates, such as PCRs for DBR/CBR ATM service. As previously described, the data transport units of the flows that are routed to a given output port are queued, after being routed, in per-flow queues. The data transport units at the heads of these queues then are admitted by an admission controller 61 (to the exclusion of all other transport units) for scheduling on a time line calendar queue 63 by a scheduler 62. The scheduler 62, in turn, performs per-flow virtual clock computations on these head of queue transport units to schedule them for release from the calendar queue 63 in accordance with their respective theoretical finish times, VT(f, j+1), or their respective theoretical start times. Please see Section III.C.4 above.
Real time advantageously is incremented on the time line 66 at a rate that enables the shaped, time multiplexed output traffic to essentially fill the bandwidth of the output link. As will be recalled, the maximum number of resolvable time slots into which the scheduler 62 can map the head of queue members of the respective flows is based on the ratio of the maximum permissible frequency to the minimum permissible frequency of those flows. Thus, the rate at which real time is incremented from bucket-to-bucket is a rationale multiple of the cell rate.
Data transport units residing in time slots which represent times that are earlier than or equal to the current real time of reference for the time line 66 are eligible for transmission and, therefore, are linked into a transport list 65 as previously described. However, those data transport units which reside in time slots that are associated with later time slots of the time line 66 remain in a pending state until system real time advances sufficiently to reach those time slots. To avoid rollover ambiguities, the time line 66 is designed to ensure that all references to earlier scheduled data transport limits are removed from each time slot before any references to later scheduled transport units are inserted therein in anticipation of the next scan.
While the above-described arrangement effectively shapes conforming DBR/CBR ATM flows to the PCRs specified by their traffic contracts, it does not aid in bringing the Cell Delay Variation (CDVs) of those flows into conformity with the τPCR parameters of their traffic contracts.
C. Multiple Priority Levels for Minimizing Relative CDV
In accordance with the present invention, data transport units that are delivered to a multiplexing point, such as an output port of an ATM switch, by flows having different frequencies are prioritized so that the data transport units of the higher frequency flows are given transmit priority over any data transport units of lower frequency flows with which they happen to collide. As shown in FIG. 3, this transmit priority can be implemented by steering the data transport units that are admitted for scheduling by a stalled virtual clock scheduling mechanism 63 or the like to one or another of a plurality of priority rank ordered time-lines 66a-66e or output FIFO queues based on the frequencies of the flows to which those respective data transport units belong. For example, for an ATM switch, it may be advisable to implement on the order of five different frequency dependent/class of service dependent output priorities, including (1) a top priority for cells from flows that have negotiated output rates of at least 1/16 of the full rate of the output link (i.e., its aggregate bandwidth), (2) a second priority for cells form flows having negotiated output rates ranging from 1/16 to 1/256 of the output link rate, and (3) a third priority for cells from flows having negotiated output rates ranging from 1/256 to 1/4096 of the link rate. The lower two priorities then suitably are established for ABR connections that have non-zero negotiated MCR rates and for UBR connections and ABR connections that have MCR rates of 0, respectively.
As will be appreciated the present invention effectively reduces the CDVs of the higher frequency flows, without materially increasing the CDVs of the lower frequency flows. As a general rule, the CDV that is tolerable is a function of the negotiated rate for a flow. For example, a CDV of 100 cell times is very large with respect to an expected emission interval of one cell every 10 cells, but generally insignificant if the negotiated emission interval is only one cell every 2029 cells.
When a calendar queue mechanism is employed to schedule the data transport units or cells of the different frequency flows for transmission, the high frequency high priority flows need to be resolved to the precision of a single cell time while being scheduled to achieve an acceptably low CDV, but the low frequency/low priority flows can be more coarsely resolved to a precision of, say, 16 cell times. This means that the number of time slots on the calendar queue 63 can be reduced. This enables the amount of memory that is required to implement the calendar queue 63 to be reduced at the cost of losing some typically unneeded precision in the scheduling of the head of queue cells of the lower frequency flows.
It is to be understood that the frequency based prioritization technique which the present invention provide for resolving transmission conflicts at multiplex points among flows of different nominally fixed frequencies may be employed in many different applications for reducing the relative jitter of the flows, including in applications having work conserving per-flow output queues for feeding cells or other data transport units into such a multiplex point.
D. Traffic Shaping to SCR/IBT and PCR Parameters for Real Time and Non-Real Time SBR/VBR Service
As previously pointed out, an SBR or rt--SBR flow (equivalent to a VBR flow) conforms with its traffic contract if it not only conforms to its negotiated GCRA (1/PCR, τPCR) but also to its negotiated GCRA (1/SCR, τIBT). In accordance with this invention, it has been recognized that a stalled virtual clock calendar queue 63 (FIG. 3) can be employed to bring one or more flows into conformance with such a traffic contract at the egress of a network element, such as an output port of the ATM switch 21 (FIG. 1). To that end, the flow of cells (i.e., data transport units) from the output of the calendar queue are shaped to the negotiated PCR parameter for the flow unless and until GCRA (1/SCR, τIBT) is true, at which point the output flow is shaped to its negotiated SCR parameter.
As shown in FIG. 4, one way to accomplish this is to enqueue admitting successive cells of a flow, f, into the associated per-VC queue for scheduling by the scheduler 62 at an initial rate determined by the negotiated PCR parameter for that flow. If it is determined at 75 that the cells of the flow f are being output at a rate conforming to the GCRA (1/SCR, τIBT) for that flow, the scheduler 62 is controlled to continue to schedule subsequent cells of the flow, f, on the calendar queue 63 in accordance with its PCR parameter. On the other hand, if it is determined at 75 that the cells of the flow, f, are being output from the calendar queue 63 at a rate that does not conform to the GCRA (1/SCR, τIBT) for the flow, the scheduler 62 then is controlled to schedule these subsequent cells on the calendar queue 63 in accordance with the negotiated SCR parameter for the flow, f. As will be appreciated, the incremental amount by which the virtual clock for each successive cell of the flow f is incremented in the connection record for the flow f is easy to switch back and forth as required between the PCR emission interval T=1/PCR and the SCR emission interval T=1/SCR.
Alternatively, as shown in FIG. 5, the admission controller may admit cells from the flow f for scheduling by the scheduler 62 on a relatively low priority stalled virtual clock calendar queue 81 or on a relatively high priority stalled virtual clock calendar queue 82. If it is determined at 75 that the aggregate rate at which the cells of this flow f are being output form these calendar queues 81 and 82, conforms to GCRA (1/SCR, τIBT), incoming cells of the flow f then are scheduled on the low priority calendar queue 81 by the scheduler 62 in accordance with the negotiated PCR for the flow. On the other hand, if it is determined at 75 that the rate at which the cells of the flow f are being output does not conform to GCRA (1/SCR, τIBT), incoming cells of that flow then are scheduled on the high priority calendar queue 82 by the scheduler 62 in accordance with the negotiated SCR parameter. As shown, steering logic 83 steers the output of the scheduler 62 to the high priority or low priority calendar queues 81 or 82 depending on whether the GCRA (1/SCR, τIBT) test 75 returns a true or false state.
Any transmission collisions that occur are resolved in favor of outputting the SCR scheduled cells from the high priority queue 82 prior to the PCR scheduled cells from the low priority queue 82. This enables earlier scheduled cells to be output in advance of subsequently scheduled cells, thereby preserving cell order.
E. Traffic Shaping to MCR and PCR Parameters for ABR Service in Networks Having Source-to-Destination ABR Control Loops
As will be recalled, the standard ABR traffic contract contemplates explicitly or implicitly specified PCR and MCR parameters, where MCR may equal 0. An ABR flow that conforms to its GCRA (1/MCR, τMCR) is valid and entitled to service, but the network may not be giving the flow the bandwidth to which it is entitled. Contrastingly, a flow which violates its GCRA (1/PCR, τPCR) is non-conforming. Thus, ABR connections or flows that are routed to the output of a network or network element, such as by the ATM switch 21, advantageously are shaped to ensure: (1) that the ABR flows with non-zero MCR guarantees receive adequate output bandwidth to effectively satisfy those guarantees; and (2) that none of the ABR flows violate their PCR commitments at such output. In networks that have multiple multiplex points, it is useful to perform this shaping at each of the multiplex points.
FIG. 6 illustrates one technique for shaping ABR flows or VC connections to conform them to their traffic contracts at an output of a network or network element. As shown, the rates at which the respective flows are requesting output service are monitored; first to determine at 85 whether the flows are or are not GCRA (1/MCR, τMCR) compliant, and then to determine at 86 whether the GCRA (1/MCR, τMCR) non-compliant flows are or are not GCRA (1/PCR, τPCR) compliant. Control signals reflecting the results of these cascaded tests 85 and 86 are fed back to the scheduler 62 and its associated steering logic 87 to permit appropriate rate shaping adjustments to be made to the rates at which the data transport units (e.g., cells) of the respective flows are fed to the output. As will be appreciated, the desired state is for all of the ABR flows to be GCRA (1/MCR, τMCR) non-compliant (or just barely compliant) and GCRA (1/PCR, τPCR) false/compliant because those algorithms test for minimum and maximum acceptable flow rates, respectively.
More particularly, GCRA (1/MCR, τMCR) compliant flows may not be receiving the output bandwidth that they need to satisfy their MCR guarantees. Therefore, when such a flow is identified at 85, the scheduler 62 and its steering logic 87 are set-up to schedule subsequently received references to data transport units (e.g., cells) of that flow on a relatively high priority stalled virtual clock calendar queue 88 for output at a rate somewhat in excess of its guaranteed MCR. For example, these subsequently received cell or packet references suitably are scheduled on the calendar queue 88 for emission at a rate that is determined by multiplying the MCR for the flow by a predetermined speed-up factor. This causes the network to give these additional potentially "lagging" flows the additional output bandwidth that is needed to satisfy their MCR guarantees.
GCRA (1/MCR, τMCR) non-compliant ABR flows are further tested at 86 to determine whether they are demanding output service at acceptably low or unacceptably high GCRA (1/PCR, τPCR) compliant or non-compliant rates, respectively. The results of this test are captured by another control signal which is fed back to the scheduler 62 and its steering logic 87 to set them up for rate sensitive enqueuing of the subsequently received references to these GCRA (1/MCR, τMCR) non-compliant flows on a lower priority queue 89. Specifically, the subsequently received references to a flow that is found to be GCRA (1/PCR, τPCR) compliant at 86 are appended to the tail of the transmit list for the ABR flows with MCR guarantees for it is serviced in round-robin order. Contrastingly, when a flow is found to be GCRA (1/PCR, τPCR) non-compliant at 86, the subsequently received references for that flow are scheduled by the scheduler 62 on a non-work conserving, stalled virtual clock calendar queue in accordance with the PCR for that flow, thereby imposing a PCR limit on the flow.
More generally, it will be evident that the embodiment of FIG. 6 implements the following ABR traffic shaping algorithm:
If GCRA (1/MCR, τMCR) compliant then enqueue in high priority queue at rate MCR*speedup
else if GCRA (1/PCR, τPCR) compliant then enqueue in low-priority work conserving queue
else enqueue in low-priority non-work conserving queue based on PCR emission interval.
However, alternatives that are based on similar and different principles will suggest themselves.
For example, as shown in FIG. 7, one potentially attractive alternative is to enqueue the references to the data transport units or cells of flows that are found to be GCRA (1/MCR, τMCR) non-compliant and GCRA (1/PCR, τPCR) compliant at 85 and 86 (FIG. 4), respectively, in both (1) the high priority calendar queue 88 at a MCR scheduling interval, and (2) the work conserving region of the lower priority queue. This creates a "race" condition because whenever one instance of such a dual queued reference is reached for service in either of the queues, a delinker 90 removes the other instance of that reference from the other queue. This means that a tighter bound may be maintained on the tolerance, τ. The traffic shaping algorithm of this modified embodiment is:
At enqueue:
enqueue in high priority queue with rate MCR;
if GCRA (1/PCR, τPCR) compliant then enqueue in low-priority work conserving queue;
else enqueue in low-priority non-work conserving queue based on PCR emission interval;
At dequeue:
if dequeuing from high priority queue then delink from low priority queue else delink from high priority queue.
FIG. 8 illustrates still another alternative for shaping ABR connections or flows. In this embodiment, the output bandwidth that is provided for each MCR non-compliant ABR flow that has a non-zero MCR guarantee is dynamically adjusted based on the average spacing between ABR cells on the output link (i.e., at the transmit side of a line interface) and the current length of the ABR "ready queue." The current length, Len, of this ABR "ready queue" conveniently is determined by measuring the length of the work conserving queue on the ABR transmit lists 65d and 65e as at 93. On the other hand, the average spacing, S, between ABR cells on the calendar queue can be determined at 99 dividing the bandwidth that is available for ABR flows after allowance is made for any non-ABR flows. The bandwidth required by these non-ABR flows suitably is determined by computing at 94 the aggregate bandwidth needed to service the transmit list 65 entries for the non-ABR flows.
For example, if it is determined at 94 that 50% of the bandwidth of the output link is available for the ABR flows, it follows that the average space, S, between ABR cells or data transport units on the output link is two cell times. This information, together with the computed length, Len, of the ABR "ready queue," enables the service for the MCR non-compliant ABR flows to be optimized by having the scheduler 62 schedule the incoming references for those flows on the non-work conserving calendar queue 89 at respective emissions intervals Tt of:
T.sub.t =Min (S.sub.t, Max (P.sub.t, R)) (3)
Where: R=an estimated round robin ABR
service time (R=current time+S*Len);
Pt =the earliest service contract compliant departure for the next cell of flow t (Pt =current time+1/PCR); and
St =the latest service contract compliant departure for the next cell of flow t (St =current time+1/MCR).
F. Traffic Shaping for Segmented ABR Connections
As is known, ABR connections may operate with source-to-destination control loops, such as shown in FIG. 9 at 101, or with segmented control loops, such as shown in FIG. 10 at 102. When segmented control loops are employed, each of the separately controlled segments functions as a virtual source, VS, for the next segment. Thus, each ABR control segment (except the first) is sourced by a virtual source which assumes the behavior of an ABR source endpoint. Backward resource management (RM) cells are removed from the control loop when they are received by a virtual source. However, each source or virtual source can compute an estimate of the available network bandwidth to its destination or virtual destination, VD, based on this feedback which, in turn, can be expressed as an Allowed Cell Rate (ACR) on a per-segment basis. Therefore, ABR traffic shaping advantageously is carried out segment-by-segment for these ABR connections with segmented control loops, using a maximum allowable per-flow data transport unit or cell rate of Max(MCR, Min(ACR, PCR). The embodiments of FIGS. 6-8 can implement such traffic shaping by setting PCR' equal to Max(MCR, Min(ACR, PCR) and then by using PCR' in place of PCR in the computations.
G. Traffic Shaping to PCR for UBR Service
The embodiment of FIG. 6 can be simplified to shape traffic to a specified PCR for UBR service. UBR service contemplates an explicitly or implicitly specified PCR, but no MCR. Thus, the provision made to enforce the ABR MCR guarantees may be eliminated, which means that the incoming references to the data transport units or cells of a UBR flow or connection may be enqueued on the queue 89 in accordance with the flowing enqueuing rules:
if GCRA(1/PCR, τPCR) compliant then enqueue in bucket at end of work conserving region
else enqueue in non-work conserving region based on PCR emission interval.
H. Rate Shaping for Servicing Multiple Physical Layers From a Single Queuing Point
As is known, Utopia 2 is a standard interface for connecting multiple physical layers, such as at 111-116 in FIG. 11, to a single ATM output queuing point. Typically, each of these physical layers 111-116 run at the same rate, but this run rate is only a fraction of the cell rate at the output of the queuing point (e.g., one of the output ports of the ATM switch 21). Thus, it may be necessary to accommodate such a rate mismatch in order to properly shape the output traffic to the traffic contracts governing the transfer of cells to the respective physical layers 111-116.
It has been found that the above-described stalled virtual clock techniques can be adopted to shape the traffic at the output of a relatively high data rate queuing point to the traffic contract requirements of a plurality of slower data rate physical layers 111-116, without any extra buffering of the traffic at the point of the rate mismatch. To accomplish this, the scheduler 62 schedules the data transport units for the flows (e.g., connections) to the different physical layers on respective actual or virtual per-physical layer stalled virtual clock calendar queues. The time slot-to-time slot granularity of these calendar queues suitably is selected to equal the ratio of MP to the data rate (i.e., cell rate) at the output of the queuing point, where MP is the lowest integer (conveniently a power of two) that is equal to or greater than the number of physical layers 111-116. This increased granularity effectively steps down the rate at which real time advances on the calendar queues to a rate which at least approximates the data rate of the physical layers 111-116. As will be appreciated, the time slot-to-time slot granularity of the per physical layer calendar queues may be further increased as described in Section VI.C above if the reduced precision in the scheduling of the lower frequency flows is tolerable.
As shown in FIG. 12, the per physical layer calendar queues of any given priority may be interleaved on a single time line 109. Thus, when a connection to a physical layer transmits a cell and reschedules the next cell for one cell time later than current time, this next cell is scheduled MP cell times after current time on the time line 109 to step the effective emission rate of the calendar queue for that particular physical layer down to or about its run rate.
As illustrated, the time line 109 is configured to service six physical layers 111-116. Thus, there still is a minor rate mismatch even after the effective emission rates of the calendar queues have been stepped down, as taught above, to approximate the run rates of the physical devices 111-116. Fortunately, however, this minor rate mismatch can be fully compensated for by adjusting the per-flow constants for the virtual clock computations (see III.I above), and by the Utopia 2 flow control for ABR and UBR connections.
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text:
*Miami used LeBron in the post when the game slowed down. It doesn't have to be your big. We've seen Gay is good at posting up and passing out of it. With a stretch 4 you can still do that and have quality spacing.
I would like a team that does both, but I would like that low-post player capable of being able to run the floor as well. Milsap is that type of guy, Boozer is not, while Jonas could grow into that role.
Twitter: @ReubenJRD NBA, Raptors writer for Daily Hive Vancouver, Toronto.
Some compelling arguments for Ilyasova becoming a Raptor in exchange for Bargnani!
The best way to predict your future is to create it - Peter Drucker
Definition of Statistics: The science of producing unreliable facts from reliable figures.
Commentary: you can get away with a lot more when you have a tradition of winning. Same action is going to be interpreted different ways.
Personally, I didn't boo at any of the few games I've been too and probably would never... but the main reason is why invest so much emotion into something that I feel the urge to express negative feelings at individuals who have no tangible impact on my life? Not to be condescending, but I kind of feel sorry for anybody that wrapped up that they absolutely have to boo. If you're just booing for fun, then whatever, to each his own, rofl
Again, not sure what you're trying to accomplish by re-opening a dead thread. The two sides are never going to agree on this; it's not like your amazing insight after last night's game is going to change that.
Definition of Statistics: The science of producing unreliable facts from reliable figures.
Also Boozer might not be Oliver Miller, but given his injury history and age, it is quite a risk to assume that he will keep being effective throughout his contract. He might even be starting his natural decline (shooting a career worst fg%...by a fair amount) already.
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subset: commoncrawl


text:
Cole Hamels gets crushed as the Phils are defeated by the Rockies, 10-3.
The Phillies starting rotation is still looking for its first quality start of 2009 as the Rockies crush the rotation's ace, Cole Hamels, for seven runs, as the Phils lose to the Rockies, 10-3.
The Phils, for the first time this season, took the lead, as Pedro Feliz, in the second inning, hit a sacrifice fly, knocking in Jayson Werth, who had earlier doubled, and had gone to third base on shortstop Troy Tulowitzki's fielding error of Raul Ibanez's groundball, making it 1-0 Phillies. Hamels, meanwhile, threw two good innings, before getting pummeled by the Rockies in the third. Clint Barmes started the inning off with a double. Opposing pitcher Jason Marquis then followed him with an RBI single, scoring Barmes, tying up the game at one all. After Dexter Fowler is called out for batter interference on a bunt attempt for the inning's first out, Ryan Spilborghs followed with a double, moving Marquis to third base, putting runners on second and third with one out. The next batter, Todd Helton, then hit into a 4-3 ground out for the inning's second out, scoring Marquis, giving the Rockies a 2-1 lead, while sending Spilborghs over to third. Garret Atkins then followed with a two-run home run, his first home run of the season, scoring Spilborghs, and making it 4-1 Rockies. Brad Hawpe then got on base with a ground-rule double. Tulowitzki followed him with a triple, scoring Hawpe, and giving the Rockies a 5-1 lead. Chris Iannetta, the ninth batter of the inning, would finally end the nightmare by poping out to Carlos Ruiz in foul territory. The Phillies cut the Rockies' lead to 5-2 as Feliz knocked in his second RBI of the game, this time with a 6-3 ground out, the second out of the inning, as he scored Werth, who had earlier doubled and had moved over to third base on an Ibanez 4-3 ground out. In the bottom half of the inning, the Rockies got the run back as Spilborghs doubled in Barmes, who had gotten on base with a single, had move over to second base on Marquis' sacrifice bunt and had gone to third on Fowler's 6-3 ground out, making it 6-2 Rockies. Helton followed with an RBI single, scoring Spilborghs, and giving the Rockies a 7-2 lead. After Hamels gave up a single to Atkins, putting runners on second and first, manager Charlie Manuel came to the mound and relieved Hamels, bringing in J.A. Happ. Happ ended the inning by getting Hawpe to ground out, 3-1, after earlier throwing a wild pitch which moved the runners up to third and second respectively. The score remained 7-2 until the bottom of the eighth, when the Rockies increased their lead with a three-run outburst. With Chad Durbin on the mound in relief, Fowler made it 8-2 Rockies with an one-out RBI single, as he knocked in Barmes, who had earlier reached base after being hit by the pitch and had moved up to second on pinch hitter Seth Smith's walk, while Smith stopped at second base. Spilborghs then singled in Smith, making it 9-2 Rockies, while sending Fowler over to third, putting runners on the corners. Helton then followed with a sacrifice fly, scoring Fowler, and giving the Rockies a 10-2 lead. In the ninth, Werth made it a 10-3 Rockies' lead as he hit a lead-off home run, his first of the season, off of Rockies' reliever Matt Belisle. But that would be it for the Phils, as Belisle got Ibanez to ground out to first, Greg Dobbs to strike out and Chris Coste to ground out, 6-3, to end the ballgame.
Cole Hamels took the lost for the Phils, as he pitched only three and two-thirds innings, giving up seven runs on eleven hits and a walk, while striking out only one batter. His record is now 0-1 with a high ERA of 17.18. J.A. Happ followed him and pitched an inning and a third of relief, giving up only one hit as he struck out one. Clay Condrey came to the mound next and pitched a 1-2-3 inning, striking out a batter. Chad Durbin then pitched an inning, giving up three runs on two hits, a walk, and a hit batter, while striking out one. Jason Marquis got the win for the Rockies, as he pitched a quality start, going seven innings, giving up just two runs on five hits and two walks, while striking out two. Marquis' record is now 1-0 with a 2.57 ERA. Alan Embree followed with a scoreless inning, giving up just one hit and a walk. Matt Belisle then pitched an inning of relief, giving up a run on one hit, Werth's home run, as he struck out a batter.
Jayson Werth led the team by going four for four, with two singles, a double and a home runs, scoring all three Phillies' run, increasing his batting average to .333. Chase Utley also had a good day, as he went two for three with a walk, increaing his average to .429. Carlos Ruiz, who went 0 for 2, with his average dropping down to .273, was taken out of the game for an injury to his right oblique.
The Phillies (1-3) will continue their three-game series with the Rockies (3-1) in Denver with a night game tonight at Coors Field. The game will start at 8:10 pm Eastern Time (6:10 pm Mountain). The Phillies' starter will be Brett Myers (0-1, 6.00), who will be looking for his first win of the young season, trying to improve on his start last Sunday against the Braves. The Rockies will counter with Jorge De La Rosa, who will be starting his first game of the year. Last season, in twenty-eight games, twenty-three of which were starts, he went 10-8 with a 4.92 ERA. This season, his record is 0-0 with a -.– ERA. The Phillies will be trying to tie the series with a win tonight.


text:
Okay, I know this was somewhere in the 5th book but for some reason, I just can't find it. I don't know if I can post this since it's in the book but I just couldn't find it, but I'll still give it a try.
So, in Order of the Phoenix, it's mentioned (at the end of the book) that Hermione now has a scar because of Dolohov's spell. In the book it says the spell passed through her chest like a whip, so I'd say the scar is on her chest, but I've read some fics where it's on her stomach and I honestly don't know where it is.
I don't know if we need a reason to post this, but I'll give one anyway: on a chapter of my WIP, Hermione doesn't have a shirt on (since she's in a beach and everything) and so I need to know. Help, anyone?
At first I didn't really think about the 'whip passing through her chest' part but as I was writing the post it came to my mind. So sorry if I confused anyone.


text:
Hi All -
I know this is over, but I just wanted to post a quick report on the Little Ones Concert Series specifically with Johnny and the Sprites.
There was a temporary tent setup behind the ToT and next to RnR. This area was called the Coaster Courtyard for good reason. The tent theater was very nice. The inside of the tent had chair and stadium type seating so everyone could get a good view of the stage. I should also note that this area was used for the finish line of the Tower of Terror 13K race held on Saturday, Oct. 27th.
We had to get tickets ahead of time for the 10:00AM show. It was Saturday, Oct. 20th and it was morning EMH at the Studios so I knew I had to get there at opening to get 3 tickets. The tickets were given out on a first come, first serve basis. I told my Wife and Daughter to sleep-in while I got the tickets at rope drop... Sometimes life is rough...
This was the first time I had been to the Studios at rope drop. I had just missed it a few times before. They began admitting guests into the park at 7:50AM. Everyone was allowed up to the corner of Hollywood Blvd and Sunset. There was a rope which kept guests from going any further.
At 8:00AM an announcement with music which came on the Studios sound system welcomed guests to the Studios, etc, etc. The rope dropped and as I figured most everyone headed down Sunset Blvd towards the Theater District. I wasn't sure how many guests would be going for tickets to the 10:00AM show, but I didn't want to take any chances so I hustled as fast as I could to the Coaster Courtyard to get tickets.
Some folks headed to RnR, some to ToT, and some to the Coaster Courtyard for tickets to the show. I beat most guests and was 4th in line at the ticket distribution tent. I also picked up an autographed poster for my daughter of Johnny & The Sprites only available to AP holders. You had to ask and show your AP to receive one.
After I got my tickets and poster I headed for a nearby shop to pick up a bag. It had started raining and I didn't want the poster or tickets to get wet. I spoke with the Cast Member in the store who made a funny comment. She said every morning when the park opens it is said the park tips to the right due to the heavy crowds headed towards RnR and ToT.
So I had some time to kill before my wife and daughter joined me at the Studios for the concert. I figured since it was still early the lines at ToT and RnR would not be long. I was able to ride both within 35 minutes.
At 9:00AM I caught up with my wife and daughter at the entrance to the Studios. We were able to hit the Great Movie Ride before we needed to be in line for the show. My Daughter was very excited as she loves Johnny & The Sprites. She watches them on the Disney Channel every chance she gets.
We jumped in line at 9:35 and there were already 30 or so guests in front of us. I had not seen the inside of the tent yet so I wasn't sure what kind of seats we would get. As it turned out we were able to get seats in front of the stage and the Disney CMs allowed as many children as they could fit right in front of the stage sitting on the floor. The theater was somewhat full, so I probably didn't need to get there early for tickets, but I was able to get an early start. Johnny & The Sprites are very popular these days I guess.
Needless to say my Daughter was amazed when she saw Johnny and the rest of his friends as the show started. He came down from the stage during one of his songs and gave Anna (my daughter) a high five and interacted with the other kids. It was really a terrific show.
Here are some photos:
Signage at the front of the park
More signage in the Coaster Courtyard with ToT in the background
Ticket booth at the Coaster Courtyard
The concert tent
Merchandise tent for the event. Disney never misses a beat.
The stage inside the tent displayed the exact TV set of the Johnny & The Sprites show on the Disney Channel.
Johnny himself. The place went crazy when he came out. You would have thought Elvis had been resurected from the dead.
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Little Ones Concert Series
Posted 29 October 2007 - 07:53 PM
Posted 29 October 2007 - 10:01 PM
I just posted some info from the Little Ones concert series I went to for Dan Zanes but your info is along the lines of what I gathered. This tent will remain up for Super Soap Weekend.
How crowded was your show Aaron? My 11:15 Dan Zanes concert was a ghost town.
How crowded was your show Aaron? My 11:15 Dan Zanes concert was a ghost town.
Posted 30 October 2007 - 08:53 AM
I saw your post Matt. The 10:00AM Johnny & The Sprites show was more than half full. I think they are much more popular right now than Dan Zanes. Also, the morning rain may have drove some people to the show since it is a covered venue; however, most attractions at the Studios are covered.
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text:
School-University Partnership Internship Program (SUP)
NOTE: This program option will be going on hiatus beginning Spring, 2010. Please watch our website for updates on when this program will be reinstated.
The School-University Partnership Internship Program option is a two-year internship in which successful candidates are compensated for full-time classroom teaching while satisfying the requirements for the Multiple Subjects Teaching Credential. This program is sequentially planned and candidates will take classes as a member of a cohort (group).
The SUP Internship Program offers:
- Supportive hands-on training
- Working with students from diverse backgrounds
- Risk taking to improve school practice
- A collaborative, team-oriented setting
- Part-time (50%) or Full-time paid teaching preparation
- A high level of professionalism in your work environment
- Flexibility
- Hard work with tremendous rewards
Apply now for an opportunity to earn a beginning teachers salary and be a part of a professional learning community, which provides beginning teacher support during your career through collaborative, pre-professional preparation. This option starts in the summer. Candidates interested in this program option should apply in the spring.
Is This Program for You?
This program is for individuals who:
- Have experience working with children in school settings
- Will work very hard
- Want to make a difference
- Value collaboration and understand how hard it is
- Value academic learning
- See diversity as a strength
- Have an interest in becoming highly skilled, critically reflective practitioners
Application Process
- ATTEND A GROUP ADVISEMENT SESSION. These orientation sessions, held twice a month, are required of all students who wish to enroll Multiple Subject Credential Program.
- APPLY TO THE MULIPLE SUBJECT TEACHING CREDENTIAL PROGRAM. Follow the general applicaton for admission to the credential program through the Department of Elementary Education. On the application form, indicate your interest in the SUP Program.
Intern Selection Process
- Initial paper screening of all applications will be done by the Elementary Education Department.
- First interview for candidates who pass paper screening will be done by the SUP program coordinator.
- Second interview for candidateswill be done jointly by the SUP program coordinator and district representative.
NOTE: Candidates accepted to the internship program who are not successful in getting a teaching position will be automatically transferred into the basic credential program.
Program Course Schedule
Summer Semester (prior to internship)
- EDTE 162: Meeting the Needs of Second-Language Learners (3 units)
- EDTE 246: Classroom Management and Governance (3 units)
- Summer School Field Experience (8-12, Mon-Fri in July)
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- EDEL 143A: Orientation to Student Teaching (5 units)
- EDEL 108A: Curriculum: Reading/Language Arts-PART ONE (3 units)
- EDEL 102: Psychological Foundations of Education (3 units)
Spring Semester Year 1
- EDEL 143A: Orientation to Student Teaching (5 units)
- EDEL 108A: Curriculum: Reading/Language Arts-PART TWO (3 units)
- EDEL 108D: Curriculum: Mathematics (3 units)
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- EDEL 108B: Curriculum: Science (3 units)
- EDEL 108C: Curriculum: Social Studies (3 units)
Fall Semester Year 2
- EDEL 143B: Student Teaching: Practicum (5 units)
- EDEL 103:Social-Multicultural Foundations of Education (3 units)
Spring Semester Year 2
- EDEL 143B: Student Teaching: Practicum (3 units)
NOTE: The courses below may be taken before or anytime during the program, however ALL must be completed prior to applying for the Preliminary Multiple Subject Teaching Credential.
- EDTE 190: Health Education for the Classroom Teacher (3 units)
- EDSE 192: Mainstreaming the Exceptional Pupil (3 units)
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