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This is because the garbage collector is rarely being activated.
These closures must not be moved by the garbage collector.
The result of all this is that the garbage collector reclaims redundant update frames.
We achieve this by allocating control flow compiled code on the heap, and extending the heap garbage collector to support this new data structure.
A concurrent garbage collector might have trouble finding all these pointers quickly.
The update routine must then be careful to save any pointers being returned in registers into a place where the garbage collector will find them.
Deallocation is done by the garbage collector once for each segment when there are no more references to a segment.
Figure 4 illustrates the difference between the characteristic space profiles for a reference-counting garbage collector and for a raark-and-sweep or two-space copying collector.
These schemes rely on support from the underlying runtime system, especially the garbage collector.
The garbage collector and other components of the run-time system must be modified to cope with the larger tagged cells.
This could be useful to a garbage collector.
The next attempt to allocate space from the heap is then certain to call the garbage collector.
This allows us to avoid the need for a garbage collector, which is particularly important to guarantee that our cost analysis evaluates real runtime costs.
So it should be possible to improve the low-level management of non-determinism and to combine this with an efficient garbage collector.
The efficiency could probably be increased further by using a generational garbage collector instead of a copying one.