Lumiera: The Inner Core

The Lumiera team agreed on using GNU coding style with slight adaptations. Generally speaking, we strive to keep the code base consistent and stick to widely accepted guidelines and best practices. See our separate Coding Guidelines page. Function naming conventions and other details are also described in several RFCs.

The central location for all design and technical documentation is the Lumiera website you’re reading right now. Besides that, a summary and introduction for various components can be found in the file-level doxygen comments, while details are usualy explained in the class and function level comments.

We strive to use Test-Driven-Development: tests are to be written first, defining the specification of the entity being tested. Then things get implemented until they pass their tests. While increasing the initial development effort significantly, this approach is known to lead to clearly defined components and overall increases code quality. In practice, this approach might not be suitable at times, nevertheless we try to stick to it as far as possible and maintain fairly complete test coverage.

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Within Lumiera, »Player« is the name for a subsystem responsible for organising and tracking ongoing playback and render processes. The player subsystem does not perform or even manage any render operations, nor does it handle the outputs directly.
Yet it addresses some central concerns:

as mru cache, round robin reused

Lumiera has its own abstract file handles which store the state and name of a file. The associated filehandle doesn’t need to be kept open and will be reopened on demand. Hardlinked files are recognized and opened only once.

All file access is done by memory mapping to reduce data copies between userland and kernel. Moreover the kernel becomes responsible to schedule paging (which will be augmented by lumiera) to make the best use of available resources. Memory is mapped in larger windows of reasonable sized chunks, possibly overlapping each other. Clients may request a specific continuous set of data from the file to be accessible as memory block.

Manages serveral classes of threads in pools. The threadpool is reasonable dumb. Higher level management will be done by the Schedulers and Jobs.

While on itself just a thin interface and adaptation layer forwarding calls to the primary backend facilities, the Engine Interface is the primary point of service accessed by Proc-Layer to use the backend services for rendering content.

The Engine Interface is cast in terms of an calculation stream entity. This is a stream of expected and ongoing frame calculations for multiple channels, to be managed as a compound. The calculated frames will be delivered into an output slot right away. No assumptions are made regarding the ordering of these individual calculations — they may be performed in parallel, constrained by input and resource prerequisites solely.

For the actual processing, calculation streams need to be translated into individual calculation jobs to be scheduled. For each uniform segment of the effective timeline, the typical recursive descent call characteristic for pull processing results in a Job Ticket.

This structural descriptor of the actual calculations to be performed is the base for creating individual jobs: Already specialised for a distinct segment of the effective timeline and tailored for the needs of a given calculation stream, the job ticket acts as blueprint for the actual jobs to be enqueued with the Scheduler.

Scheduling Queues for different purposes:

Higher priority jobs ordered by a deadline time plus some (negative) hysteresis. Jobs are started when they approach their deadline. Jobs who miss their deadline are never scheduled here.

Background jobs scheduled by priority and timeout.

Timer driven queue which starts jobs at defined absolute times. Timer might be also an external synchronization entity.

Running Lumiera requires a lot different resources, such as CPU-Time, Threads, IO Bandwidth, Memory, Address space and so on. Many of this resources are rather hard limited and the system will return errors when this limits are hit, but often one does not even reach this hard limits because performance will degrade way before coming into the realm of this limits. The goal for Lumiera is to find a sweet spot for operating with optimal performance. Thus we have some facilities to monitor and adjust resource usage depending and adapting to the system and current circumstances.

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This is a “whiteboard” system, allowing implementation-level services to publish some piece of information as advice, while other parts of the system may pick up this advice just by a name token, without requiring a direct knowledge of the original advisor. The Advice System is a singleton service maintaining a lookup and registration data structure. Individual piece of advice elements are stored as value copy. Publishing new advice requires locking, but accessing advice is lock-free (actually there needs to be a memory barrier “somewhere”, otherwise the advice requesting client might not see new advice)

Advice is organised into categories, based on the type of the advice item and some additional symbolic identifiers. Actually these are syntactically represented similar to the atoms of a rules based system (“Prolog syntax”). Currently (2010) only ground terms (completely static symbols) are supported. But the intention is to extend the system to allow for variables in these terms. This will turn the matching of advice provisions and requests into an unification, allowing the advice item to be parametrised.

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The header lib/util.hpp defines some shortcuts heavily used throughout the code base. The idea is to highlight a common semantic meaning, while hide differentiation on the technical details.

In a similar vein, the header lib/util-foreach.hpp provides a generic “for-each-element” mechanism, which works for all STL containers, but also for all Lumiera Forward Iterators. The loop body is provided as a functor. In case this functor is a predicate (boolean result), the and_all and has_any functions allow to test for conjunction and disjunction.

General purpose Locking is based on object monitors. Performance critical code in the backend uses mutexes, condition vars and rwlocks direcly. Intentionally no semaphores.

Time values are represented by a family of opaque date types with overloaded operators. The implementation is based on gavl_time_t, an integral (µsec) time tick value. Thus, the arithmetic on time values and time spans is limited and any Time handling and conversion is centralised in library routines.

We distinguish between time values and a quantisation into a frame or sample grid. In any case, quantisation has to be done once, explicitly and as late as possible. See the Time handling RfC.

The Lumiera library defines several flavours of time values. All of these internal time values have in common that they are opaque and not directly related to any human readable or external (wall clock) time. Moreover, most of these time values are immutable, yet there are two mechanisms to allow for changing time values (TimeVar and Mutation).

Special flavours of these time values additionally carry the reference to an (frame) alignment grid, while being time value entities in all other respects. But only those quantised time values expose functions to convert the internal opaque time into a human readable or externally relevant time format — including SMPTE or frame counts.

Thus, any usage of time values is forced to refer to such a time alignment grid explicitly, at least when leaving the realm of the internal opaque time values. This is the point where the time quantisation is actually performed, imposing some information loss (as any rounding operation does).
A time alignment grid is exactly that: a set of functions to perform this lossy conversion. Implicitly this involves the definition of an time origin (reference point where the external time is zero), and typically this also includes the definition of a frame rate (but in the most general case, this frame rate might be variable and change at various places of the time axis). Consequently, all time grids are Assets and defined as part of the concrete session.

Deliberately, Lumiera stays below the level of utilising a dependency injection framework. Consequently, we access most services by type name, pulling up a single implementation instance on demand. Rather than placing this singleton lifecycle logic into the individual implementation classes, we use a singleton factory, managing the lifecycle through static variables and placing the singleton object into a static memory block. Singleton initialisation is protected by a monitor per singleton type, while shutdown is triggered by the clean-up of a static variable. This results in the general policy that within Lumiera, performing any “business” code in the application shutdown phase (after exiting main()) is strictly prohibited. Generally speaking, destructors must not perform any significant work and are are expected to be failsafe.

By convention, when clients are expected actively to access the singleton instance, the interface class holds the singleton factory as a public static member with the name instance. This allows clients to write SomeService::instance() to get a reference to the implementation.

There is a mechanism to “push aside” the existing singleton instance and shadow it temporarily with a mock implementation. Besides, there is a variation of the general singleton factory, allowing to fabricate a specific subclass of the exposed interface. Both of these facilities are rather technically involved and require some specific set-up — fortunately it turned out that they are used only occasionally and rarely required. (Probably this is a result of Lumiera being developed test-driven — things are being written mostly in a unit test friendly fashion).

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Iterators serve to decouple a collection of elements from the actual data type implementation used to manage those elements. The use of iterators is a design pattern. → see detailed library documentation

Formatting values with printf is a notorious source for intricate errors. Additionally, using (s|n)printf can be clunky in practice, and it doesn’t support custom defined string conversions, which are an important diagnostic aid when working with objects. We might use Boost, which provides the boost::format library to address those problems. Unfortunately including this header-only library solution incurs a significant overhead, both in terms of compilation time and code size. While maybe still acceptable at the implementation level, using boost::format is thus certainly a “no go” for any code residing in headers frequently included.

To work around these problems, we provide a front-end wrapper, defined in lib/format-string.hpp. This allows to keep the actual boost::format based implementation confined to a single translation unit, while still being able to use all primitive types as usual with boost::format or printf. Additionally, our frontend automatically invokes a custom or built-in string conversion, if applicable, it dereferences pointers and catches all errors encountered while in formatting. So it’s well suited for usage in error handling code.

This pervasively used handle type is based on the reference counting smart-pointer type of C++ (boost::shared_ptr and C++11). Typically this also includes a pointer to some kind of implementation service.
Yet still, handles based on lib::Handle<TY> should not be confused with smart pointers. Rather, we use the ref-counting mechanism to invoke a custom clean-up callback when the last handle goes out of scope. Typically, the implementation service is kept entirely opaque, while the copyable handle objects also implement a front-end interface for client access.

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When implementing services, frequently we encountered the situation that a manager object creates and owns some component elements or sub-services. The library provides two special collections, which also take ownership of their contents and care for automatic clean-up. Especially, contrary to the STL containers, those custom containers support use of non-copyable object (as a rule, all objects with reference semantics are defined non-copyable in Lumiera).

There is a family of holder objects, all based on placement-new of the contained object into an embedded buffer. The purpose is to “piggyback” an object inline, without the need for heap allocated storage. Frequently the motivation for this usage pattern is type erasure: the detailed knowledge context used to build some kind of object is discarded prior to further use, relying on generic information and the hidden parametrisation henceforth.

The C++ language has direct support for value semantics and allows to build value objects to be treated as first class citizens. Unfortunately this doesn’t fit well with the chosen approach to object orientation, where polymorphism relies on reference semantics. Thus, most of the fundamental design patterns drive us into having an object manager somewhere hidden within the implementation level, to manage the memory for maintaining the subclass instances to be concealed at the usage site.

To avoid this dilemma, we utilise the technique of the opaque holder to provide objects with value semantics, while actually placing the instance of a subclass into the inline buffer. Clients access this embedded object by automatic type conversion to the interface type, which gives us polymorphism. While the definition of such a beast is quite involved, the runtime overhead is surprisingly low. When compared with standard polymorphism, creating objects and invoking operations has zero overhead, while copying and assignment incur the cost of an additional virtual call, assuming the target objects cooperate by mixing in a copy management interface.

a minimal interface for an array-like entity, but exposing only references to the contained elements. Obviously this means to use a virtual call for the subscript operation. This interface allows interfaces to expose something array-like without committing to a specific implementation type for the exposed elements within the “array”. The Lumiera library provides a set of standard implementations for this lib::RefArray interface, including a vector based and a directly array based variant.

Lumiera utilises several custom allocators, each tailored to a specific purpose. All these allocator-frontends share a common pooling allocation backend

This allocation scheme is used within the context of the Builder and the Low-Level-Model. The predominant usage trend in this realm is to create and wire a family of small objects right after each other, within a build process. These objects are intended to work together and will be discarded all at once, after hot-swapping a new version of that model segment.

This allocation framework is used at various places when a large number of similar objects is expected to be coming and going. New objects are placement-constructed into the allocated space and immediately wrapped with a ref-counting smart-ptr to manage ownership.

Based on the allocator interface of the STL, allowing just for plain allocations and de-allocations without any further instance and lifecycle management. Currently (as of 2011) this allocator isn’t used much — it is conceivable that later we’ll detect some specific STL based containers to be performance critical with respect to allocation.

Fast memory pools for moderately small static sized allocations in highly dynamic situations.

Provides a small number of round robin buffers which need not to be freed. Must only be used locally when no deep recursion may use tmpbufs. Using these wrong (recursively) will result in corrupted data.

Very fast and efficient from smallest too hugest allocations. No need to care for free()

ppmpl.h

Some wrapers for the C memory management functions malloc, calloc, realloc and free which never fail. In case of an error the resourcecollector in the backend is invoked to free resources or doing an emergency shutdown.

Safe wrapers for some string functions from the C-library which also never fail. NULL strings are propagated to "" empty strings.

Just a macro for simplifying vtable function calls VCALL(Handle, function, arguments…) translates to Handle→vtable→function (Handle, arguments…)

The user is responsible for setting up a vtable member in his datastructures this macro does some NoBug checks that self and function are initialized.